Re: [bitcoin-dev] RBF Pinning with Counterparties and Competing Interest

Re: [bitcoin-dev] RBF Pinning with Counterparties and Competing Interest

[Matt Corallo]

Hmm, that's an interesting suggestion, it definitely raises the bar for attack execution rather significantly. Because lightning (and other second-layer systems) already relies heavily on uncensored access to blockchain data, its reasonable to extend the "if you don't have enough blocks, aggressively query various sources to find new blocks, or, really just do it always" solution to "also send relevant transactions while we're at it".

Sadly, unlike for block data, there is no consensus mechanism for nodes to ensure the transactions in their mempools are the same as others. Thus, if you focus on sending the pinning transaction to miner nodes directly (which isn't trivial, but also not nearly as hard as it sounds), you could still pull off the attack. However, to do it now, you'd need to
wait for your counterparty to broadcast the corresponding timeout transaction (once it is confirmable, and can thus get into mempools), turning the whole thing into a mempool-acceptance race. Luckily there isn’t much cost to *trying*, though it’s less likely you’ll succeed.

There are also practical design issues - if you’re claiming multiple HTLC output in a single transaction the node would need to provide reject messages for each input which is conflicted, something which we’d need to think hard about the DoS implications of.

In any case, while it’s definitely better than nothing, it’s unclear if it’s really the kind of thing I’d want to rely on for my own funds.

Matt


> On 4/22/20 2:24 PM, David A. Harding wrote:
>> On Mon, Apr 20, 2020 at 10:43:14PM -0400, Matt Corallo via Lightning-dev wrote:
>> A lightning counterparty (C, who received the HTLC from B, who
>> received it from A) today could, if B broadcasts the commitment
>> transaction, spend an HTLC using the preimage with a low-fee,
>> RBF-disabled transaction.  After a few blocks, A could claim the HTLC
>> from B via the timeout mechanism, and then after a few days, C could
>> get the HTLC-claiming transaction mined via some out-of-band agreement
>> with a small miner. This leaves B short the HTLC value.
> 
> IIUC, the main problem is honest Bob will broadcast a transaction
> without realizing it conflicts with a pinned transaction that's already
> in most node's mempools.  If Bob knew about the pinned transaction and
> could get a copy of it, he'd be fine.
> 
> In that case, would it be worth re-implementing something like a BIP61
> reject message but with an extension that returns the txids of any
> conflicts?  For example, when Bob connects to a bunch of Bitcoin nodes
> and sends his conflicting transaction, the nodes would reply with
> something like "rejected: code 123: conflicts with txid 0123...cdef".
> Bob could then reply with a a getdata('tx', '0123...cdef') to get the
> pinned transaction, parse out its preimage, and resolve the HTLC.
> 
> This approach isn't perfect (if it even makes sense at all---I could be
> misunderstanding the problem) because one of the problems that caused
> BIP61 to be disabled in Bitcoin Core was its unreliability, but I think
> if Bob had at least one honest peer that had the pinned transaction in
> its mempool and which implemented reject-with-conflicting-txid, Bob
> might be ok.
> 
> -Dave

Re: [bitcoin-dev] RBF Pinning with Counterparties and Competing Interest

[David A. Harding]

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On Wed, Apr 22, 2020 at 03:53:37PM -0700, Matt Corallo wrote:
> if you focus on sending the pinning transaction to miner nodes
> directly (which isn't trivial, but also not nearly as hard as it
> sounds), you could still pull off the attack. 

If the problem is that miners might have information not available to
the network in general, you could just bribe them for that knowledge.
E.g. as Bob's refund deadline approaches and he begins to suspect that
mempool shenanigans are preventing his refund transaction from
confirming, he takes a confirmed P2WPKH UTXO he's been saving for use in
CPFP fee bumps and spends part of its value (say 1 mBTC) to the
following scriptPubKey[1],

    OP_SHA256 <hash_whose_preimage_bob_wants> OP_EQUAL

Assuming the feerate and the bribe amount are reasonable, any miner who
knows the preimage is incentivized to include Bob's transaction and a
child transation spending from it in their next block.  That child
transaction will include the preimage, which Bob will see when he
processes the block.

If any non-miner knows the preimage, they can also create that child
transaction.  The non-miner probably can't profit from this---miners can
just rewrite the child transaction to pay themselves since there's no
key-based security---but the non-miner can at least pat themselves on
the back for being a good Summaritan.  Again Bob will learn the preimage
once the child transaction is included in a block, or earlier if his
wallet is monitoring for relays of spends from his parent transaction.

Moreover, Bob can first create a bribe via LN and, in that case, things
are even better.  As Bob's deadline approaches, he uses one of his
still-working channels to send a bunch of max-length (20 hops?) probes
that reuse the earlier HTLC's <hash>.  If any hop along the path knows
the preimage, they can immediately claim the probe amount (and any
routing fees that were allocated to subsequent hops).  This not only
gives smaller miners with LN nodes an equal chance of claiming the
probe-bribe as larger miners, but it also allows non-miners to profit
from learning the preimage from miners.

That last part is useful because even if, as in your example, the
adversary is able to send one version of the transaction just to miners
(with the preimage) and another conflicting version to all relay nodes
(without the preimage), miners will naturally attempt to relay the
preimage version of the transaction to other users; if some of those
users run modified nodes that write all 32-byte witness data blobs to a
database---even if the transaction is ultimately rejected as a
conflict---then targetted relay to miners may not be effective at
preventing Bob from learning the preimage.

Obviously all of the above requires people run additional software to
keep track of potential preimages[2] and then compare them to hash
candidates, plus it requires additional complexity in LN clients, so I
can easily understand why it might be less desirable than the protocol
changes under discussion in other parts of this thread.  Still, with
lots of effort already being put into watchtowers and other
enforcement-assistance services, I wonder if this problem can be largely
addressed in the same general way.

-Dave

[1] Requires a change to standard relay and mining policy.
[2] Pretty easy, e.g.

    bitcoin-cli getrawmempool \
    | jq -r .[] \
    | while read txid ; do
      bitcoin-cli getrawtransaction $txid true | jq .vout[].scriptPubKey.asm
    done \
    | grep -o '\<[0-9a-f]\{64\}\>'

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning David,

Unfortunately this technique does not look like it is compatible to payment points rather than hashes, and we would really like to upgrade to payment points sooner rather than later.
Nobody but B can recognize the signature as revealing the scalar behind a particular point (the main privacy advantage of using points).
Even variations on this are not useable with payment points.

Regards,
ZmnSCPxj

> On Wed, Apr 22, 2020 at 03:53:37PM -0700, Matt Corallo wrote:
>
> > if you focus on sending the pinning transaction to miner nodes
> > directly (which isn't trivial, but also not nearly as hard as it
> > sounds), you could still pull off the attack.
>
> If the problem is that miners might have information not available to
> the network in general, you could just bribe them for that knowledge.
> E.g. as Bob's refund deadline approaches and he begins to suspect that
> mempool shenanigans are preventing his refund transaction from
> confirming, he takes a confirmed P2WPKH UTXO he's been saving for use in
> CPFP fee bumps and spends part of its value (say 1 mBTC) to the
> following scriptPubKey[1],
>
> OP_SHA256 <hash_whose_preimage_bob_wants> OP_EQUAL
>
> Assuming the feerate and the bribe amount are reasonable, any miner who
> knows the preimage is incentivized to include Bob's transaction and a
> child transation spending from it in their next block. That child
> transaction will include the preimage, which Bob will see when he
> processes the block.
>
> If any non-miner knows the preimage, they can also create that child
> transaction. The non-miner probably can't profit from this---miners can
> just rewrite the child transaction to pay themselves since there's no
> key-based security---but the non-miner can at least pat themselves on
> the back for being a good Summaritan. Again Bob will learn the preimage
> once the child transaction is included in a block, or earlier if his
> wallet is monitoring for relays of spends from his parent transaction.
>
> Moreover, Bob can first create a bribe via LN and, in that case, things
> are even better. As Bob's deadline approaches, he uses one of his
> still-working channels to send a bunch of max-length (20 hops?) probes
> that reuse the earlier HTLC's <hash>. If any hop along the path knows
> the preimage, they can immediately claim the probe amount (and any
> routing fees that were allocated to subsequent hops). This not only
> gives smaller miners with LN nodes an equal chance of claiming the
> probe-bribe as larger miners, but it also allows non-miners to profit
> from learning the preimage from miners.
>
> That last part is useful because even if, as in your example, the
> adversary is able to send one version of the transaction just to miners
> (with the preimage) and another conflicting version to all relay nodes
> (without the preimage), miners will naturally attempt to relay the
> preimage version of the transaction to other users; if some of those
> users run modified nodes that write all 32-byte witness data blobs to a
> database---even if the transaction is ultimately rejected as a
> conflict---then targetted relay to miners may not be effective at
> preventing Bob from learning the preimage.
>
> Obviously all of the above requires people run additional software to
> keep track of potential preimages[2] and then compare them to hash
> candidates, plus it requires additional complexity in LN clients, so I
> can easily understand why it might be less desirable than the protocol
> changes under discussion in other parts of this thread. Still, with
> lots of effort already being put into watchtowers and other
> enforcement-assistance services, I wonder if this problem can be largely
> addressed in the same general way.
>
> -Dave
>
> [1] Requires a change to standard relay and mining policy.
> [2] Pretty easy, e.g.
>
> bitcoin-cli getrawmempool \
> | jq -r .[] \
> | while read txid ; do
> bitcoin-cli getrawtransaction $txid true | jq .vout[].scriptPubKey.asm
> done \
> | grep -o '\<[0-9a-f]\{64\}\>'
>
> Lightning-dev mailing list
> Lightning-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/lightning-dev

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Matt Corallo]

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Given transaction relay delays and a network topology that is rather transparent if you look closely enough, I think this is very real and very practical (double-digit % success rate, at least, with some trial and error probably 50+). That said, we all also probably know most of the people who know enough to go from zero to doing this practically next week. As for motivated folks who have lots of time to read code and dig, this seems like something worth fixing in the medium term.

Your observation is what’s largely led me to conclude there isn’t a lot we can do here without a lot of creativity and fundamental rethinking of our approach. One thing I keep harping on is maybe saving the blind-CPFP approach with a) eltoo, and b) some kind of magic transaction relay metadata that allows you to specify “this spends at least one output on any transaction that spends output X” so that nodes can always apply it properly. But maybe that’s a pipedream of complexity. I know Antoine has other thoughts.

Matt

> On Jun 22, 2020, at 04:04, Bastien TEINTURIER via bitcoin-dev <bitcoin-dev@lists.linuxfoundation.org> wrote:
> 
> 
> Hey ZmnSCPxj,
> 
> I agree that in theory this looks possible, but doing it in practice with accurate control
> of what parts of the network get what tx feels impractical to me (but maybe I'm wrong!).
> 
> It feels to me that an attacker who would be able to do this would break *any* off-chain
> construction that relies on absolute timeouts, so I'm hoping this is insanely hard to
> achieve without cooperation from a miners subset. Let me know if I'm too optimistic on
> this!
> 
> Cheers,
> Bastien
> 
>> Le lun. 22 juin 2020 à 10:15, ZmnSCPxj <ZmnSCPxj@protonmail.com> a écrit :
>> Good morning Bastien,
>> 
>> > Thanks for the detailed write-up on how it affects incentives and centralization,
>> > these are good points. I need to spend more time thinking about them.
>> >
>> > > This is one reason I suggested using independent pay-to-preimage
>> > > transactions[1]
>> >
>> > While this works as a technical solution, I think it has some incentives issues too.
>> > In this attack, I believe the miners that hide the preimage tx in their mempool have
>> > to be accomplice with the attacker, otherwise they would share that tx with some of
>> > their peers, and some non-miner nodes would get that preimage tx and be able to
>> > gossip them off-chain (and even relay them to other mempools).
>> 
>> I believe this is technically possible with current mempool rules, without miners cooperating with the attacker.
>> 
>> Basically, the attacker releases two transactions with near-equal fees, so that neither can RBF the other.
>> It releases the preimage tx near miners, and the timelock tx near non-miners.
>> 
>> Nodes at the boundaries between those that receive the preimage tx and the timelock tx will receive both.
>> However, they will receive one or the other first.
>> Which one they receive first will be what they keep, and they will reject the other (and *not* propagate the other), because the difference in fees is not enough to get past the RBF rules (which requires not just a feerate increase, but also an increase in absolute fee, of at least the minimum relay feerate times transaction size).
>> 
>> Because they reject the other tx, they do not propagate the other tx, so the boundary between the two txes is inviolate, neither can get past that boundary, this occurs even if everyone is running 100% unmodified Bitcoin Core code.
>> 
>> I am not a mempool expert and my understanding may be incorrect.
>> 
>> Regards,
>> ZmnSCPxj
> _______________________________________________
> bitcoin-dev mailing list
> bitcoin-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Bastien TEINTURIER]

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Hey ZmnSCPxj,

I agree that in theory this looks possible, but doing it in practice with
accurate control
of what parts of the network get what tx feels impractical to me (but maybe
I'm wrong!).

It feels to me that an attacker who would be able to do this would break
*any* off-chain
construction that relies on absolute timeouts, so I'm hoping this is
insanely hard to
achieve without cooperation from a miners subset. Let me know if I'm too
optimistic on
this!

Cheers,
Bastien

Le lun. 22 juin 2020 à 10:15, ZmnSCPxj <ZmnSCPxj@protonmail.com> a écrit :

> Good morning Bastien,
>
> > Thanks for the detailed write-up on how it affects incentives and
> centralization,
> > these are good points. I need to spend more time thinking about them.
> >
> > > This is one reason I suggested using independent pay-to-preimage
> > > transactions[1]
> >
> > While this works as a technical solution, I think it has some incentives
> issues too.
> > In this attack, I believe the miners that hide the preimage tx in their
> mempool have
> > to be accomplice with the attacker, otherwise they would share that tx
> with some of
> > their peers, and some non-miner nodes would get that preimage tx and be
> able to
> > gossip them off-chain (and even relay them to other mempools).
>
> I believe this is technically possible with current mempool rules, without
> miners cooperating with the attacker.
>
> Basically, the attacker releases two transactions with near-equal fees, so
> that neither can RBF the other.
> It releases the preimage tx near miners, and the timelock tx near
> non-miners.
>
> Nodes at the boundaries between those that receive the preimage tx and the
> timelock tx will receive both.
> However, they will receive one or the other first.
> Which one they receive first will be what they keep, and they will reject
> the other (and *not* propagate the other), because the difference in fees
> is not enough to get past the RBF rules (which requires not just a feerate
> increase, but also an increase in absolute fee, of at least the minimum
> relay feerate times transaction size).
>
> Because they reject the other tx, they do not propagate the other tx, so
> the boundary between the two txes is inviolate, neither can get past that
> boundary, this occurs even if everyone is running 100% unmodified Bitcoin
> Core code.
>
> I am not a mempool expert and my understanding may be incorrect.
>
> Regards,
> ZmnSCPxj
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning Bastien,

> Thanks for the detailed write-up on how it affects incentives and centralization,
> these are good points. I need to spend more time thinking about them.
>
> > This is one reason I suggested using independent pay-to-preimage
> > transactions[1]
>
> While this works as a technical solution, I think it has some incentives issues too.
> In this attack, I believe the miners that hide the preimage tx in their mempool have
> to be accomplice with the attacker, otherwise they would share that tx with some of
> their peers, and some non-miner nodes would get that preimage tx and be able to
> gossip them off-chain (and even relay them to other mempools).

I believe this is technically possible with current mempool rules, without miners cooperating with the attacker.

Basically, the attacker releases two transactions with near-equal fees, so that neither can RBF the other.
It releases the preimage tx near miners, and the timelock tx near non-miners.

Nodes at the boundaries between those that receive the preimage tx and the timelock tx will receive both.
However, they will receive one or the other first.
Which one they receive first will be what they keep, and they will reject the other (and *not* propagate the other), because the difference in fees is not enough to get past the RBF rules (which requires not just a feerate increase, but also an increase in absolute fee, of at least the minimum relay feerate times transaction size).

Because they reject the other tx, they do not propagate the other tx, so the boundary between the two txes is inviolate, neither can get past that boundary, this occurs even if everyone is running 100% unmodified Bitcoin Core code.

I am not a mempool expert and my understanding may be incorrect.

Regards,
ZmnSCPxj

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Bastien TEINTURIER]

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Thanks for the detailed write-up on how it affects incentives and
centralization,
these are good points. I need to spend more time thinking about them.

This is one reason I suggested using independent pay-to-preimage
> transactions[1]
>

While this works as a technical solution, I think it has some incentives
issues too.
In this attack, I believe the miners that hide the preimage tx in their
mempool have
to be accomplice with the attacker, otherwise they would share that tx with
some of
their peers, and some non-miner nodes would get that preimage tx and be
able to
gossip them off-chain (and even relay them to other mempools).

If they are actively helping the attacker, they wouldn't spend the
pay-to-preimage tx,
unless they gain more from it than the share the attacker gives them. This
becomes
a simple bidding war, and the honest user will always be the losing party
here (the
attacker has nothing to lose). For this reason I'm afraid it wouldn't work
out in practice
as well as we'd hope...what do you think? And even if the honest user wins
the bidding
war, the attack still steals money from that user; it just goes into the
miner's pocket.

But from the perspective of a single LN node, it
> might make more sense to get the information and *not* share it
>

I think it depends. If this attack becomes doable in practice and we see it
happening,
LN routing nodes and service providers have a very high incentive to thwart
these attacks,
because otherwise they'd lose their business as people would leave the
lightning network.

As long as enough nodes think that way (with "enough" being a very hard to
define quantity),
this should mitigate the attack. The only risk would be a big "exit scam"
scenario, but the
coordination cost between all these nodes makes that scenario unlikely
(IMHO).

Thanks,
Bastien

Le sam. 20 juin 2020 à 12:37, David A. Harding <dave@dtrt.org> a écrit :

> On Sat, Jun 20, 2020 at 10:54:03AM +0200, Bastien TEINTURIER wrote:
> > We're simply missing information, so it looks like the only good
> > solution is to avoid being in that situation by having a foot in
> > miners' mempools.
>
> The problem I have with that approach is that the incentive is to
> connect to the highest hashrate pools and ignore the long tail of
> smaller pools and solo miners.  If miners realize people are doing this,
> they may begin to charge for information about their mempool and the
> largest miners will likely be able to charge more money per hashrate
> than smaller miners, creating a centralization force by increasing
> existing economies of scale.
>
> Worse, information about a node's mempool is partly trusted.  A node can
> easily prove what transactions it has, but it can't prove that it
> doesn't have a certain transaction.  This implies incumbent pools with a
> long record of trustworthy behavior may be able to charge more per
> hashrate than a newer pools, creating a reputation-based centralizing
> force that pushes individual miners towards well-established pools.
>
> This is one reason I suggested using independent pay-to-preimage
> transactions[1].  Anyone who knows the preimage can mine the
> transaction, so it doesn't provide reputational advantage or direct
> economies of scale---pay-to-preimage is incentive equivalent to paying
> normal onchain transaction fees.  There is an indirect economy of
> scale---attackers are most likely to send the low-feerate
> preimage-containing transaction to just the largest pools, so small
> miners are unlikely to learn the preimage and thus unlikely to be able
> to claim the payment.  However, if the defense is effective, the attack
> should rarely happen and so this should not have a significant effect on
> mining profitability---unlike monitoring miner mempools which would have
> to be done continuously and forever.
>
> ZmnSCPxj noted that pay-to-preimage doesn't work with PTLCs.[2]  I was
> hoping one of Bitcoin's several inventive cryptographers would come
> along and describe how someone with an adaptor signature could use that
> information to create a pubkey that could be put into a transaction with
> a second output that OP_RETURN included the serialized adaptor
> signature.  The pubkey would be designed to be spendable by anyone with
> the final signature in a way that revealed the hidden value to the
> pubkey's creator, allowing them to resolve the PTLC.  But if that's
> fundamentally not possible, I think we could advocate for making
> pay-to-revealed-adaptor-signature possible using something like
> OP_CHECKSIGFROMSTACK.[3]
>
> [1]
> https://lists.linuxfoundation.org/pipermail/lightning-dev/2020-April/002664.html
> [2]
> https://lists.linuxfoundation.org/pipermail/lightning-dev/2020-April/002667.html
> [3] https://bitcoinops.org/en/topics/op_checksigfromstack/
>
> > Do you think it's unreasonable to expect at least some LN nodes to
> > also invest in running nodes in mining pools, ensuring that they learn
> > about attackers' txs and can potentially share discovered preimages
> > with the network off-chain (by gossiping preimages found in the
> > mempool over LN)?
>
> Ignoring my concerns about mining centralization and from the
> perspective of just the Lightning Network, that doesn't sound
> unreasonable to me.  But from the perspective of a single LN node, it
> might make more sense to get the information and *not* share it,
> increasing your security and allowing you to charge lower routing fees
> compared to your competitors.  This effect would only be enhanced if
> miners charged for their mempool contents (indeed, to maximize their
> revenue, miners might require that their mempool subscribers don't share
> the information---which they could trivially enforce by occasionally
> sending subscribers a preimage specific to the subscriber and seeing if
> it propagated to the public network).
>
> > I think that these recent attacks show that we need (at least some)
> > off-chain nodes to be somewhat heavily invested in on-chain operations
> > (layers can't be fully decoupled with the current security assumptions
> > - maybe Eltoo will help change that in the future?).
>
> I don't see how eltoo helps.  Eltoo helps ensure you reach the final
> channel state, but this problem involves an abuse of that final state.
>
> -Dave
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning again,

> Good morning Dave,
>
> > ZmnSCPxj noted that pay-to-preimage doesn't work with PTLCs.[2] I was
> > hoping one of Bitcoin's several inventive cryptographers would come
> > along and describe how someone with an adaptor signature could use that
> > information to create a pubkey that could be put into a transaction with
> > a second output that OP_RETURN included the serialized adaptor
> > signature. The pubkey would be designed to be spendable by anyone with
> > the final signature in a way that revealed the hidden value to the
> > pubkey's creator, allowing them to resolve the PTLC. But if that's
> > fundamentally not possible, I think we could advocate for making
> > pay-to-revealed-adaptor-signature possible using something like
> > OP_CHECKSIGFROMSTACK.[3]
>
> <snip>
>
> The signed message could be a signature to `SIGHASH_NONE`, finally an actual use for that flag.

If you are going to embed it in an `OP_RETURN` in the same transaction, you also need `SIGHASH_ANYPREVOUT`, otherwise you cannot embed the adaptor signature for spending from that transaction in the transaction being spent, it also implies `A[p4s] = a[p4s] * G` is a one-time-use keypair.

Regards,
ZmnSCPxj

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning Dave,

> ZmnSCPxj noted that pay-to-preimage doesn't work with PTLCs.[2] I was
> hoping one of Bitcoin's several inventive cryptographers would come
> along and describe how someone with an adaptor signature could use that
> information to create a pubkey that could be put into a transaction with
> a second output that OP_RETURN included the serialized adaptor
> signature. The pubkey would be designed to be spendable by anyone with
> the final signature in a way that revealed the hidden value to the
> pubkey's creator, allowing them to resolve the PTLC. But if that's
> fundamentally not possible, I think we could advocate for making
> pay-to-revealed-adaptor-signature possible using something like
> OP_CHECKSIGFROMSTACK.[3]


Not a cryptographer, I just play one on the Internet, but maybe the pay-for-signature construction could work...?

Assuming a PTLC has a pointlocked branch, which involves signing with MuSig(A, B).
A offers to B the amount if B reveals the secret `t` behind `T = t * G`; A knows `T` but not `t`.
This is done by B handing over `R[B]` and `s'[B]`:

    R = R[A] + R[B] + T
    s'[B] = r[B] + h(MuSig(A, B) | R | m) * b

Then A provides its partial signature to B.

    s[A] = r[A] + h(MuSig(A, B) | R | m) * a

B has to complete the signature by:

    s = s[A] + s'[B] + t

Since A knows both `s[A]` and `s'[B]`, once it knows `s`, it can compute `t`.


Now, we can massage the equation for `s`:

    s = r[A] + h(MuSig(A, B) | R | m) * a + r[B] + h(MuSig(A, B) | R | m) * b + t
    ; multiply both sides by G
    s * G = r[A] * G + h(MuSig(A, B) | R | m) * a * G + r[B] * G + h(MuSig(A, B) | R | m) * b * G + t * G
    ; replace with public points
    s * G = R[A] + h(MuSig(A, B) | R | m) * A + R[B] + h(MuSig(A, B) | R | m) * B + T

Note that A can compute `s * G` above, because it generated `R[A]`, was given `R[B]` and `T`, and knows who `A` and `B` are.

So what A needs to do is to offer a fund that can only be claimed by leaking knowledge of `s` behind `s * G`.
A can do this by creating a new keypair `A[p4s] = a[p4s] * G` and putting a fund into it.

Then A generates an `R[A][p4s] = r[A][p4s] * G`, and computes:

    R[p4s] = R[A][p4s] + s * G
    s'[A][p4s] = r[A][p4s] + h(A | R[p4s] | m) * a[p4s]

The signed message could be a signature to `SIGHASH_NONE`, finally an actual use for that flag.

A reveals publicly (in an `OP_RETURN` as you suggest):

* `R[A][p4s]`
* `s * G`
* `s'[A][p4s]`
* `A[p4s]` - Already the Schnorr output pubkey.

In order to complete the above signature, a third party C has to learn `s` from B.

The third party has to scan every onchain 1-of-1 signature for an `s` that matches `s * G`, so there is greater processing (point multiplies are more expensive than hashes, also there are more 1-of-1s).
But once learned, the third party can complete the signature and claim the funds.
And A then learns `s`, from which it can derive `t`.

The third party learns about which channel (i.e. the UTXO that was spent to create the PTLC in the first place), but never learns `t` or `T`, which is a small but nice privacy bonus.


Regards,
ZmnSCPxj

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[David A. Harding]

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On Sat, Jun 20, 2020 at 10:54:03AM +0200, Bastien TEINTURIER wrote:
> We're simply missing information, so it looks like the only good
> solution is to avoid being in that situation by having a foot in
> miners' mempools.

The problem I have with that approach is that the incentive is to
connect to the highest hashrate pools and ignore the long tail of
smaller pools and solo miners.  If miners realize people are doing this,
they may begin to charge for information about their mempool and the
largest miners will likely be able to charge more money per hashrate
than smaller miners, creating a centralization force by increasing
existing economies of scale.

Worse, information about a node's mempool is partly trusted.  A node can
easily prove what transactions it has, but it can't prove that it
doesn't have a certain transaction.  This implies incumbent pools with a
long record of trustworthy behavior may be able to charge more per
hashrate than a newer pools, creating a reputation-based centralizing
force that pushes individual miners towards well-established pools.

This is one reason I suggested using independent pay-to-preimage
transactions[1].  Anyone who knows the preimage can mine the
transaction, so it doesn't provide reputational advantage or direct
economies of scale---pay-to-preimage is incentive equivalent to paying
normal onchain transaction fees.  There is an indirect economy of
scale---attackers are most likely to send the low-feerate
preimage-containing transaction to just the largest pools, so small
miners are unlikely to learn the preimage and thus unlikely to be able
to claim the payment.  However, if the defense is effective, the attack
should rarely happen and so this should not have a significant effect on
mining profitability---unlike monitoring miner mempools which would have
to be done continuously and forever.

ZmnSCPxj noted that pay-to-preimage doesn't work with PTLCs.[2]  I was
hoping one of Bitcoin's several inventive cryptographers would come
along and describe how someone with an adaptor signature could use that
information to create a pubkey that could be put into a transaction with
a second output that OP_RETURN included the serialized adaptor
signature.  The pubkey would be designed to be spendable by anyone with
the final signature in a way that revealed the hidden value to the
pubkey's creator, allowing them to resolve the PTLC.  But if that's
fundamentally not possible, I think we could advocate for making
pay-to-revealed-adaptor-signature possible using something like
OP_CHECKSIGFROMSTACK.[3]

[1] https://lists.linuxfoundation.org/pipermail/lightning-dev/2020-April/002664.html
[2] https://lists.linuxfoundation.org/pipermail/lightning-dev/2020-April/002667.html
[3] https://bitcoinops.org/en/topics/op_checksigfromstack/

> Do you think it's unreasonable to expect at least some LN nodes to
> also invest in running nodes in mining pools, ensuring that they learn
> about attackers' txs and can potentially share discovered preimages
> with the network off-chain (by gossiping preimages found in the
> mempool over LN)?

Ignoring my concerns about mining centralization and from the
perspective of just the Lightning Network, that doesn't sound
unreasonable to me.  But from the perspective of a single LN node, it
might make more sense to get the information and *not* share it,
increasing your security and allowing you to charge lower routing fees
compared to your competitors.  This effect would only be enhanced if
miners charged for their mempool contents (indeed, to maximize their
revenue, miners might require that their mempool subscribers don't share
the information---which they could trivially enforce by occasionally
sending subscribers a preimage specific to the subscriber and seeing if
it propagated to the public network).

> I think that these recent attacks show that we need (at least some)
> off-chain nodes to be somewhat heavily invested in on-chain operations
> (layers can't be fully decoupled with the current security assumptions
> - maybe Eltoo will help change that in the future?).

I don't see how eltoo helps.  Eltoo helps ensure you reach the final
channel state, but this problem involves an abuse of that final state.

-Dave

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Bastien TEINTURIER]

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Hello Dave and list,

Thanks for your quick answers!

The attacker would be broadcasting the latest
> state, so the honest counterparty would only need to send one blind
> child.
>

Exactly, if the attacker submits an outdated transaction he would be
shooting himself in the foot,
as we could claim the revocation paths when seeing the transaction in a
block and get all the
channel funds (since the attacker's outputs will be CSV-locked).

The only way your Bitcoin peer will relay your blind child
> is if it already has the parent transaction.
>

That's an excellent point that I missed in the blind CPFP carve-out trick!
I think this makes the
blind CPFP carve-out quite hard in practice (even using getdata - thanks
for detailing that option)...

In the worst case scenario where most miners' mempools contain the
attacker's tx and the rest of
the network's mempools contains the honest participant's tx, I think there
isn't much we can do.
We're simply missing information, so it looks like the only good solution
is to avoid being in that
situation by having a foot in miners' mempools. Do you think it's
unreasonable to expect at least
some LN nodes to also invest in running nodes in mining pools, ensuring
that they learn about
attackers' txs and can potentially share discovered preimages with the
network off-chain (by
gossiping preimages found in the mempool over LN)? I think that these
recent attacks show that
we need (at least some) off-chain nodes to be somewhat heavily invested in
on-chain operations
(layers can't be fully decoupled with the current security assumptions -
maybe Eltoo will help
change that in the future?).

Thank you for your time!
Bastien



Le ven. 19 juin 2020 à 22:53, David A. Harding <dave@dtrt.org> a écrit :

> On Fri, Jun 19, 2020 at 03:58:46PM -0400, David A. Harding via bitcoin-dev
> wrote:
> > I think you're assuming here that the attacker broadcast a particular
> > state.
>
> Whoops, I managed to confuse myself despite looking at Bastien's
> excellent explainer.  The attacker would be broadcasting the latest
> state, so the honest counterparty would only need to send one blind
> child.  However, the blind child will only be relayed by a Bitcoin peer
> if the peer also has the parent transaction (the latest state) and, if
> it has the parent transaction, you should be able to just getdata('tx',
> $txid) that transaction from the peer without CPFPing anything.  That
> will give you the preimage and so you can immediately resolve the HTLC
> with the upstream channel.
>
> Revising my conclusion from the previous post:
>
> I think the strongman argument for the attack would be that the attacker
> will be able to perform a targeted relay of the low-feerate
> preimage-containing transaction to just miners---everyone else on the
> network will receive the honest user's higher-feerate expired-timelock
> transaction.  Unless the honest user happens to have a connection to a
> miner's node, the user will neither be able to CPFP fee bump nor use
> getdata to retrieve the preimage.
>
> Sorry for the confusion.
>
> -Dave
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[David A. Harding]

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On Fri, Jun 19, 2020 at 03:58:46PM -0400, David A. Harding via bitcoin-dev wrote:
> I think you're assuming here that the attacker broadcast a particular
> state.  

Whoops, I managed to confuse myself despite looking at Bastien's
excellent explainer.  The attacker would be broadcasting the latest
state, so the honest counterparty would only need to send one blind
child.  However, the blind child will only be relayed by a Bitcoin peer
if the peer also has the parent transaction (the latest state) and, if
it has the parent transaction, you should be able to just getdata('tx',
$txid) that transaction from the peer without CPFPing anything.  That
will give you the preimage and so you can immediately resolve the HTLC
with the upstream channel.

Revising my conclusion from the previous post:

I think the strongman argument for the attack would be that the attacker
will be able to perform a targeted relay of the low-feerate
preimage-containing transaction to just miners---everyone else on the
network will receive the honest user's higher-feerate expired-timelock
transaction.  Unless the honest user happens to have a connection to a
miner's node, the user will neither be able to CPFP fee bump nor use
getdata to retrieve the preimage.

Sorry for the confusion.

-Dave

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[David A. Harding]

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On Fri, Jun 19, 2020 at 09:44:11AM +0200, Bastien TEINTURIER via Lightning-dev wrote:
> The gist is here, and I'd appreciate your feedback if I have wrongly
> interpreted some of the ideas:
> https://gist.github.com/t-bast/22320336e0816ca5578fdca4ad824d12

Quoted text below is from the gist:

> The trick to protect against a malicious participant that broadcasts a
> low-fee HTLC-success or Remote-HTLC-success transaction is that we can
> always blindly do a CPFP carve-out on them; we know their txid

I think you're assuming here that the attacker broadcast a particular
state.  However, in a channel which potentially had thousands of state
changes, you'd have to broadcast a blind child for each previous state
(or at least each previous state that pays the attacker more than the
latest state).  That's potentially thousands of transactions times
potentially dozens of peers---not impossible, but it seems messy.

I think there's a way to accomplish the same goal for less bandwidth and
zero fees.  The only way your Bitcoin peer will relay your blind child
is if it already has the parent transaction.  If it has the parent, you
can just request it using P2P getdata(type='tx', id=$txid).[1]  You can
batch multiple txid requests together (up to 50,000 IIRC) to minimize
overhead, making the average cost per txid a tiny bit over 36 bytes.
If you receive one of the transactions you request, you can extract the
preimage at no cost to yourself (except bandwidth).  If you don't
receive a transaction, then sending a blind child is hopeless
anyway---your peers won't relay it.

Overall, it's hard for me to guess how effective your proposal would be
at defeating the attack.  I think the strongman argument for the attack
would be that the attacker will be able to perform a targeted relay of
their outdated state to just miners---everyone else on the network
will receive the counterparty's honest final-state close.  Unless the
counterparty happens to have a connection to a miner's node, the
counterparty will neither be able to CPFP fee bump nor use getdata to
retrieve the preimage.

It seems to me it's practical for a motivated attacker to research which
IP addresses belong to miners so that they can target them, whereas
honest users won't practically be able to do that research (and, even if
they could, it would create a centralizing barrier to new miners
entering the market if users focused on maintaining connections to
previously-known miners).

-Dave

[1] You'd have to be careful to not attempt the getdata too soon after
    you think the attacker broadcast their old state, but I think that
    only means waiting a single block, which you have to do anyway to
    see if the honest final-commitment transaction confirmed.  See
    https://github.com/bitcoin/bitcoin/pull/18861


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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Bastien TEINTURIER]

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Good morning list,

Sorry for being (very) late to the party on that subject, but better late
than never.

A lot of ideas have been thrown at the problem and are scattered across
emails, IRC discussions,
and github issues. I've spent some time putting it all together in one
gist, hoping that it will
help stir the discussion forward as well as give newcomers all the
background they need to ramp up
on this issue and join the discussion, bringing new ideas to the table.

The gist is here, and I'd appreciate your feedback if I have wrongly
interpreted some of the ideas:
https://gist.github.com/t-bast/22320336e0816ca5578fdca4ad824d12

Readers of this list can probably directly skip to the "Future work"
section. I believe my
"alternative proposal" should loosely reflect Matt's proposal from the very
first mail of this
thread; note that I included anchors and new txs only in some places, as I
think they aren't
necessary everywhere.

My current state-of-mind (subject to change as I discover more potential
attacks) is that:

* The proposal to add more anchors and pre-signed txs adds non-negligible
complexity and hurts
small HTLCs, so it would be better if we didn't need it
* The blind CPFP carve-out trick is a one shot, so you'll likely need to
pay a lot of fees for it
to work which still makes you lose money in case an attacker targets you
(but the money goes to
miners, not to the attacker - unless he is the miner). It's potentially
hard to estimate what fee
you should put into that blind CPFP carve-out because you have no idea what
the current fee of the
pinned success transaction package is, so it's unsure if that solution will
really work in practice
* If we take a step back, the only attack we need to protect against is an
attacker pinning a
preimage transaction while preventing us from learning that preimage for at
least `N` blocks
(see the gist for the complete explanation). Please correct me if that
claim is incorrect as it
will invalidate my conclusion! Thus if we have:
* a high enough `cltv_expiry_delta`
* [off-chain preimage broadcast](
https://github.com/lightningnetwork/lightning-rfc/issues/783)
(or David's proposal to do it by sending txs that can be redeemed via only
the preimage)
* LN hubs (or any party commercially investing in running a lightning node)
participating in
various mining pools to help discover preimages
* decent mitigations for eclipse attacks
* then the official anchor outputs proposal should be safe enough and is
much simpler?

Thank you for reading, I hope the work I put into this gist will be useful
for some of you.

Bastien

Le ven. 24 avr. 2020 à 00:47, Matt Corallo via bitcoin-dev <
bitcoin-dev@lists.linuxfoundation.org> a écrit :

>
>
> On 4/23/20 8:46 AM, ZmnSCPxj wrote:
> >>> -   Miners, being economically rational, accept this proposal and
> include this in a block.
> >>>
> >>> The proposal by Matt is then:
> >>>
> >>> -   The hashlock branch should instead be:
> >>> -   B and C must agree, and show the preimage of some hash H (hashlock
> branch).
> >>> -   Then B and C agree that B provides a signature spending the
> hashlock branch, to a transaction with the outputs:
> >>> -   Normal payment to C.
> >>> -   Hook output to B, which B can use to CPFP this transaction.
> >>> -   Hook output to C, which C can use to CPFP this transaction.
> >>> -   B can still (somehow) not maintain a mempool, by:
> >>> -   B broadcasts its timelock transaction.
> >>> -   B tries to CPFP the above hashlock transaction.
> >>> -   If CPFP succeeds, it means the above hashlock transaction exists
> and B queries the peer for this transaction, extracting the preimage and
> claiming the A->B HTLC.
> >>
> >> Note that no query is required. The problem has been solved and the
> preimage-containing transaction should now confirm just fine.
> >
> > Ah, right, so it gets confirmed and the `blocksonly` B sees it in a
> block.
> >
> > Even if C hooks a tree of low-fee transactions on its hook output or
> normal payment, miners will still be willing to confirm this and the B hook
> CPFP transaction without, right?
>
> Correct, once it makes it into the mempool we can CPFP it and all the
> regular sub-package CPFP calculation will pick it
> and its descendants up. Of course this relies on it not spending any other
> unconfirmed inputs.
> _______________________________________________
> bitcoin-dev mailing list
> bitcoin-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Matt Corallo]

On 4/23/20 8:46 AM, ZmnSCPxj wrote:
>>> -   Miners, being economically rational, accept this proposal and include this in a block.
>>>
>>> The proposal by Matt is then:
>>>
>>> -   The hashlock branch should instead be:
>>> -   B and C must agree, and show the preimage of some hash H (hashlock branch).
>>> -   Then B and C agree that B provides a signature spending the hashlock branch, to a transaction with the outputs:
>>> -   Normal payment to C.
>>> -   Hook output to B, which B can use to CPFP this transaction.
>>> -   Hook output to C, which C can use to CPFP this transaction.
>>> -   B can still (somehow) not maintain a mempool, by:
>>> -   B broadcasts its timelock transaction.
>>> -   B tries to CPFP the above hashlock transaction.
>>> -   If CPFP succeeds, it means the above hashlock transaction exists and B queries the peer for this transaction, extracting the preimage and claiming the A->B HTLC.
>>
>> Note that no query is required. The problem has been solved and the preimage-containing transaction should now confirm just fine.
> 
> Ah, right, so it gets confirmed and the `blocksonly` B sees it in a block.
> 
> Even if C hooks a tree of low-fee transactions on its hook output or normal payment, miners will still be willing to confirm this and the B hook CPFP transaction without, right?

Correct, once it makes it into the mempool we can CPFP it and all the regular sub-package CPFP calculation will pick it
and its descendants up. Of course this relies on it not spending any other unconfirmed inputs.

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning Matt,

> > -   C directly contacts miners with an out-of-band proposal to replace its transaction with an alternative that is much smaller and has a low fee, but much better feerate.
>
> Or they can just wait. For example in today’s mempool it would not be strange for a transaction at 1 sat/vbyte to wait a day but eventually confirm.

That introduces the possibility that the entire tree (with high total fee, remember) gets confirmed, so it would be better for C to replace it with an alternative to a different address C still controls, with a slightly better fee rate but smaller (no child transactions) and lower total fee, so an economically-rational C will make that effort (and if there are still other transactions in the mempool, an economically-rational miner will accept this proposal).

But in any case this is a minor detail and the attack will work either way.

>
> > -   Miners, being economically rational, accept this proposal and include this in a block.
> >
> > The proposal by Matt is then:
> >
> > -   The hashlock branch should instead be:
> > -   B and C must agree, and show the preimage of some hash H (hashlock branch).
> > -   Then B and C agree that B provides a signature spending the hashlock branch, to a transaction with the outputs:
> > -   Normal payment to C.
> > -   Hook output to B, which B can use to CPFP this transaction.
> > -   Hook output to C, which C can use to CPFP this transaction.
> > -   B can still (somehow) not maintain a mempool, by:
> > -   B broadcasts its timelock transaction.
> > -   B tries to CPFP the above hashlock transaction.
> > -   If CPFP succeeds, it means the above hashlock transaction exists and B queries the peer for this transaction, extracting the preimage and claiming the A->B HTLC.
>
> Note that no query is required. The problem has been solved and the preimage-containing transaction should now confirm just fine.

Ah, right, so it gets confirmed and the `blocksonly` B sees it in a block.

Even if C hooks a tree of low-fee transactions on its hook output or normal payment, miners will still be willing to confirm this and the B hook CPFP transaction without, right?

Regards,
ZmnSCPxj

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Matt Corallo]

Great summary, a few notes inline.

> On Apr 22, 2020, at 21:50, ZmnSCPxj <ZmnSCPxj@protonmail.com> wrote:
> 
> Good morning lists et al,
> 
> Let me try to summarize things a little:
> 
> * Suppose we have a forwarding payment A->B->C.
> * Suppose B does not want to maintain a mempool and is running in `blocksonly` mode to reduce operational costs.

Quick point of clarification, due to the mempool lacking a consensus system (that’s the whole point, after all :p), there are several reasons to that just running a full node/having a mempool isn’t sufficient.

> * C triggers B somehow dropping the B<->C channel, such as by sending an `error` message, which will usually cause the other side to drop the channel onchain using its commitment transaction.
> * The dropped B<->C channel has an HTLC (that was set up during the A->B->C forwarding).
> * The HTLC, being used in a Poon-Dryja channel, actually has the following contract text:
> * The fund may be claimed by either of these clauses:
> * C can claim, if C shows the preimage of some hash H (hashlock branch).
> * B and C must agree, and claim after time L (timelock branch).
> * B holds a signature from C that can claim the timelock branch of the HTLC, for a transaction that spends to an output with an `OP_CHECKSEQUENCEVERIFY`.
> * The signature is `SIGHASH_ALL`, so the transaction has a fixed feerate.
> * C can "pin" the HTLC output by spending using the hashlock branch, and creating a large fee, low fee-rate (tree of) transactions.

Another: this is the simplest example. There are also games around the package size limits if I recall correctly.

> * As it is a low fee-rate, miners have no incentive to put this in a block, especially if unrelated higher-fee-rate transactions exist that would earn them more money.
> * Even in a full RBF universe, because of the anti-DoS mempool rules, B cannot evict this pinned transaction by just bidding up the feerate.
> * A replacing transaction cannot evict alternatives unless its absolute fee is greater than the absolute fee of the alternative.
> * The pinning transaction has a high fee, but is blockspace-wasteful, so it is:
>   * Undesirable to mine (low feerate).
>   * Difficult to evict (high fee).
> * Thus, B is unable to get its timelock-branch transaction in the mempools of miners.
> * C waits until the A->B HTLC times out, then:
> * C directly contacts miners with an out-of-band proposal to replace its transaction with an alternative that is much smaller and has a low fee, but much better feerate.

Or they can just wait. For example in today’s mempool it would not be strange for a transaction at 1 sat/vbyte to wait a day but eventually confirm.

> * Miners, being economically rational, accept this proposal and include this in a block.
> 
> The proposal by Matt is then:
> 
> * The hashlock branch should instead be:
> * B and C must agree, and show the preimage of some hash H (hashlock branch).
> * Then B and C agree that B provides a signature spending the hashlock branch, to a transaction with the outputs:
> * Normal payment to C.
> * Hook output to B, which B can use to CPFP this transaction.
> * Hook output to C, which C can use to CPFP this transaction.
> * B can still (somehow) not maintain a mempool, by:
> * B broadcasts its timelock transaction.
> * B tries to CPFP the above hashlock transaction.
> * If CPFP succeeds, it means the above hashlock transaction exists and B queries the peer for this transaction, extracting the preimage and claiming the A->B HTLC.

Note that no query is required. The problem has been solved and the preimage-containing transaction should now confirm just fine.

> Is that a fair summary?

Yep!

> --
> 
> Naively, and remembering I am completely ignorant of the exact details of the mempool rules, it seems to me quite strange that we are allowing an undesirable transaction (tree) into the mempool:
> 
> * Undesirable to mine (low fee-rate).
> * Difficult to evict (high fee).

As noted, such transactions today are profit in 10 hours. Just because they’re big doesn’t mean they don’t pay.

> Miners are not interested in low fee-rate transactions, as long as higher fee-rate transactions exist.
> And being difficult to evict means miners cannot get alternatives that are more lucrative for them.
> 
> The reason (as I understand it) eviction is purposely made difficult here is to prevent certain DoS attacks on Bitcoin nodes, specifically:
> 
> 1. Attacker sends a low fee-rate tx as a "root" transaction.
> 2  Attacker sends thousands of low fee-rate tx that build off the above root.

I believe the limit is 25, though the point stands, mostly from a total-size perspective.

> 3. Attacker sends a slightly higher fee-rate alternative to the root, evicting the above tree of txes.
> 4. Attacker sends thousands of low fee-rate tx that build off the latest root.
> 5. GOTO 3.
> 
> However, it seems to me, naively, that "an ounce of prevention is worth a pound of cure".

Sadly, it’s very very easy for this to be a huge amount of CPU + bandwidth.

> As I understand it, the mempool is organized already into "packages" of transactions, and adding a transaction into the mempool involves extending and merging packages.
> Perhaps the size of a package with low fee-rate (relative to the other packages in the mempool) can be limited, so that mempools drop incoming txes that extend a low-fee-rate tree of transactions.
> This means an attacker cannot send thousands of low fee-rate tx that build off some low fee-rate root tx in the first place, so it can still be evicted easily later without much impact.

There have been several proposals before around considering a transactions position in the mempool for various similar criteria. The extreme version being simply heavily rate-limiting transaction relay at low feerates and allowing much more liberal replacement of such packages. It isn’t quite perfect for this issue, though, as it may be easy for the attacker to just fill that rate-limit bucket.

> Naively, it seems to me to prevent the DoS attack as well, as at step 2 it would be prevented from sending thousands of low fee-rate tx building off the root.
> 
> As well, as I understand it, this merely tightens the mempool acceptance rules, preventing low fee-rate packages from growing (analogous to a consensus-layer softfork).
> The "cannot evict high absolute fee" rule can be retained, as the low-fee-rate package is prevented from reaching a large size.
> 
> Would that be workable as a general solution to solve (what I think is) the root cause of this problem?

It’s not clear to me that tightening the acceptance rules wouldn’t break other existing uses. Historically the 25 package size limit has proven to be an issue for users doing (somewhat naïve) centralized wallet withdraws. Sadly many users want that “payment pending” notification instantly, even if we know it to be somewhat lacking in security. Wallets which have over-compacted their UTXOs are thus stuck making long chains.

To revive an old discussion, on the original thread proposing the CPFP Carve-Out, I said this:

> As an alternative proposal, at various points there have been discussions around solving the "RBF-pinning" problem by allowing transactors to mark their transactions as "likely-to-be-RBF'ed", which could enable a relay policy where children of such transactions would be rejected unless the resulting package would be "near the top of the mempool". This would theoretically imply such attacks are not possible to pull off consistently, as any "transaction-delaying" channel participant will have to place the package containing A at an effective feerate which makes confirmation to occur soon with some likelihood. It is, however, possible to pull off this attack with low probability in case of feerate spikes right after broadcast.

To which Rusty responded (and I may be paraphrasing here): “Fuck Yea”. I’m still not much of a fan of this idea as it introduces too many constants (what is “the top of the mempool”, anyway?), and it’s unclear to me what you do as the mempool prevailing feerate changes, but it seems more along the lines or what you’re looking for here.

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning lists et al,

Let me try to summarize things a little:

* Suppose we have a forwarding payment A->B->C.
* Suppose B does not want to maintain a mempool and is running in `blocksonly` mode to reduce operational costs.
* C triggers B somehow dropping the B<->C channel, such as by sending an `error` message, which will usually cause the other side to drop the channel onchain using its commitment transaction.
* The dropped B<->C channel has an HTLC (that was set up during the A->B->C forwarding).
* The HTLC, being used in a Poon-Dryja channel, actually has the following contract text:
  * The fund may be claimed by either of these clauses:
    * C can claim, if C shows the preimage of some hash H (hashlock branch).
    * B and C must agree, and claim after time L (timelock branch).
* B holds a signature from C that can claim the timelock branch of the HTLC, for a transaction that spends to an output with an `OP_CHECKSEQUENCEVERIFY`.
  * The signature is `SIGHASH_ALL`, so the transaction has a fixed feerate.
* C can "pin" the HTLC output by spending using the hashlock branch, and creating a large fee, low fee-rate (tree of) transactions.
  * As it is a low fee-rate, miners have no incentive to put this in a block, especially if unrelated higher-fee-rate transactions exist that would earn them more money.
  * Even in a full RBF universe, because of the anti-DoS mempool rules, B cannot evict this pinned transaction by just bidding up the feerate.
    * A replacing transaction cannot evict alternatives unless its absolute fee is greater than the absolute fee of the alternative.
    * The pinning transaction has a high fee, but is blockspace-wasteful, so it is:
      * Undesirable to mine (low feerate).
      * Difficult to evict (high fee).
* Thus, B is unable to get its timelock-branch transaction in the mempools of miners.
* C waits until the A->B HTLC times out, then:
  * C directly contacts miners with an out-of-band proposal to replace its transaction with an alternative that is much smaller and has a low fee, but much better feerate.
  * Miners, being economically rational, accept this proposal and include this in a block.

The proposal by Matt is then:

* The hashlock branch should instead be:
  * B and C must agree, and show the preimage of some hash H (hashlock branch).
* Then B and C agree that B provides a signature spending the hashlock branch, to a transaction with the outputs:
  * Normal payment to C.
  * Hook output to B, which B can use to CPFP this transaction.
  * Hook output to C, which C can use to CPFP this transaction.
* B can still (somehow) not maintain a mempool, by:
  * B broadcasts its timelock transaction.
  * B tries to CPFP the above hashlock transaction.
    * If CPFP succeeds, it means the above hashlock transaction exists and B queries the peer for this transaction, extracting the preimage and claiming the A->B HTLC.

Is that a fair summary?

--

Naively, and remembering I am completely ignorant of the exact details of the mempool rules, it seems to me quite strange that we are allowing an undesirable transaction (tree) into the mempool:

* Undesirable to mine (low fee-rate).
* Difficult to evict (high fee).

Miners are not interested in low fee-rate transactions, as long as higher fee-rate transactions exist.
And being difficult to evict means miners cannot get alternatives that are more lucrative for them.

The reason (as I understand it) eviction is purposely made difficult here is to prevent certain DoS attacks on Bitcoin nodes, specifically:

1. Attacker sends a low fee-rate tx as a "root" transaction.
2  Attacker sends thousands of low fee-rate tx that build off the above root.
3. Attacker sends a slightly higher fee-rate alternative to the root, evicting the above tree of txes.
4. Attacker sends thousands of low fee-rate tx that build off the latest root.
5. GOTO 3.

However, it seems to me, naively, that "an ounce of prevention is worth a pound of cure".

As I understand it, the mempool is organized already into "packages" of transactions, and adding a transaction into the mempool involves extending and merging packages.
Perhaps the size of a package with low fee-rate (relative to the other packages in the mempool) can be limited, so that mempools drop incoming txes that extend a low-fee-rate tree of transactions.
This means an attacker cannot send thousands of low fee-rate tx that build off some low fee-rate root tx in the first place, so it can still be evicted easily later without much impact.

Naively, it seems to me to prevent the DoS attack as well, as at step 2 it would be prevented from sending thousands of low fee-rate tx building off the root.

As well, as I understand it, this merely tightens the mempool acceptance rules, preventing low fee-rate packages from growing (analogous to a consensus-layer softfork).
The "cannot evict high absolute fee" rule can be retained, as the low-fee-rate package is prevented from reaching a large size.

Would that be workable as a general solution to solve (what I think is) the root cause of this problem?

(This assumes full RBF, I suppose.)

Regards,
ZmnSCPxj

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Olaoluwa Osuntokun]

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Hi z,

Actually, the current anchors proposal already does this, since it enforces
a
CSV of 1 block before the HTLCs can be spent (the block after
confirmation). So
I think we already do this, meaning the malicious node is already forced to
use
an RBF-replaceable transaction.

-- Laolu


On Wed, Apr 22, 2020 at 4:05 PM Olaoluwa Osuntokun <laolu32@gmail.com>
wrote:

> Hi Z,
>
> > It seems to me that, if my cached understanding that `<0>
> > OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then
> adding
> > that to the hashlock branch (2 witness bytes, 0.5 weight) would be a
> pretty
> > low-weight mitigation against this attack.
>
> I think this works...so they're forced to spend the output with a non-final
> sequence number, meaning it *must* signal RBF. In this case, now it's the
> timeout-er vs the success-er racing based on fee rate. If the honest party
> (the
> one trying to time out the HTLC) bids a fee rate higher (need to also
> account
> for the whole absolute fee replacement thing), then things should generally
> work out in their favor.
>
> -- Laolu
>
>
> On Tue, Apr 21, 2020 at 11:08 PM ZmnSCPxj <ZmnSCPxj@protonmail.com> wrote:
>
>> Good morning Laolu, Matt, and list,
>>
>>
>> > >  * With `SIGHASH_NOINPUT` we can make the C-side signature
>> > >  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
>> > >  signature for a higher-fee version of HTLC-Timeout (assuming my
>> cached
>> > >  understanding of `SIGHASH_NOINPUT` still holds).
>> >
>> > no_input isn't needed. With simply single+anyone can pay, then B can
>> attach
>> > a new input+output pair to increase the fees on their HTLC redemption
>> > transaction. As you mention, they now enter into a race against this
>> > malicious ndoe to bump up their fees in order to win over the other
>> party.
>>
>> Right, right, that works as well.
>>
>> >
>> > If the malicious node uses a non-RBF signalled transaction to sweep
>> their
>> > HTLC, then we enter into another level of race, but this time on the
>> mempool
>> > propagation level. However, if there exists a relay path to a miner
>> running
>> > full RBF, then B's higher fee rate spend will win over.
>>
>> Hmm.
>>
>> So basically:
>>
>> * B has no mempool, because it wants to reduce its costs and etc.
>> * C broadcasts a non-RBF claim tx with low fee before A->B locktime (L+1).
>> * B does not notice this tx because:
>>   1.  The tx is too low fee to be put in a block.
>>   2.  B has no mempool so it cannot see the tx being propagated over the
>> P2P network.
>> * B tries to broadcast higher-fee HTLC-timeout, but fails because it
>> cannot replace a non-RBF tx.
>> * After L+1, C contacts the miners off-band and offers fee payment by
>> other means.
>>
>> It seems to me that, if my cached understanding that `<0>
>> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding
>> that to the hashlock branch (2 witness bytes, 0.5 weight) would be a pretty
>> low-weight mitigation against this attack.
>>
>> So I think the combination below gives us good size:
>>
>> * The HTLC-Timeout signature from C is flagged with
>> `OP_SINGLE|OP_ANYONECANPAY`.
>>   * Normally, the HTLC-Timeout still deducts the fee from the value of
>> the UTXO being spent.
>>   * However, if B notices that the L+1 timeout is approaching, it can
>> fee-bump HTLC-Timeout with some onchain funds, recreating its own signature
>> but reusing the (still valid) C signature.
>> * The hashlock branch in this case includes `<0> OP_CHECKSEQUENCEVERIFY`,
>> preventing C from broadcasting a low-fee claim tx.
>>
>> This has the advantages:
>>
>> * B does not need a mempool still and can run in `blocksonly`.
>> * The normal path is still the same as current behavior, we "only" add a
>> new path where if the L+1 timeout is approaching we fee-bump the
>> HTLC-Timeout.
>> * Costs are pretty low:
>>   * No need for extra RBF carve-out txo.
>>   * Just two additional witness bytes in the hashlock branch.
>> * No mempool rule changes needed, can be done with the P2P network of
>> today.
>>   * Probably still resilient even with future changes in mempool rules,
>> as long as typical RBF behaviors still remain.
>>
>> Is my understanding correct?
>>
>> Regards,
>> ZmnSCPxj
>>
>> >
>> > -- Laolu
>> >
>> > On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <
>> bitcoin-dev@lists.linuxfoundation.org> wrote:
>> >
>> > > Good morning Matt, and list,
>> > >
>> > > >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal
>> funds, how, now?")
>> > > >     =============================
>> > > >
>> > > >     You'll note that in the discussion of RBF pinning we were
>> pretty broad, and that that discussion seems to in fact cover
>> > > >     our HTLC outputs, at least when spent via (3) or (4). It does,
>> and in fact this is a pretty severe issue in today's
>> > > >     lightning protocol [2]. A lightning counterparty (C, who
>> received the HTLC from B, who received it from A) today could,
>> > > >     if B broadcasts the commitment transaction, spend an HTLC using
>> the preimage with a low-fee, RBF-disabled transaction.
>> > > >     After a few blocks, A could claim the HTLC from B via the
>> timeout mechanism, and then after a few days, C could get the
>> > > >     HTLC-claiming transaction mined via some out-of-band agreement
>> with a small miner. This leaves B short the HTLC value.
>> > >
>> > > My (cached) understanding is that, since RBF is signalled using
>> `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the
>> requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
>> > > Adding that clause (2 bytes in witness if my math is correct) to the
>> hashlock branch may be sufficient to prevent C from making an RBF-disabled
>> transaction.
>> > >
>> > > But then you mention out-of-band agreements with miners, which
>> basically means the transaction might not be in the mempool at all, in
>> which case the vulnerability is not really about RBF or relay, but sheer
>> economics.
>> > >
>> > > The payment is A->B->C, and the HTLC A->B must have a larger timeout
>> (L + 1) than the HTLC B->C (L), in abstract non-block units.
>> > > The vulnerability you are describing means that the current time must
>> now be L + 1 or greater ("A could claim the HTLC from B via the timeout
>> mechanism", meaning the A->B HTLC has timed out already).
>> > >
>> > > If so, then the B->C transaction has already timed out in the past
>> and can be claimed in two ways, either via B timeout branch or C hashlock
>> branch.
>> > > This sets up a game where B and C bid to miners to get their version
>> of reality committed onchain.
>> > > (We can neglect out-of-band agreements here; miners have the
>> incentive to publicly leak such agreements so that other potential bidders
>> can offer even higher fees for their versions of that transaction.)
>> > >
>> > > Before L+1, C has no incentive to bid, since placing any bid at all
>> will leak the preimage, which B can then turn around and use to spend from
>> A, and A and C cannot steal from B.
>> > >
>> > > Thus, B should ensure that *before* L+1, the HTLC-Timeout has been
>> committed onchain, which outright prevents this bidding war from even
>> starting.
>> > >
>> > > The issue then is that B is using a pre-signed HTLC-timeout, which is
>> needed since it is its commitment tx that was broadcast.
>> > > This prevents B from RBF-ing the HTLC-Timeout transaction.
>> > >
>> > > So what is needed is to allow B to add fees to HTLC-Timeout:
>> > >
>> > > * We can add an RBF carve-out output to HTLC-Timeout, at the cost of
>> more blockspace.
>> > > * With `SIGHASH_NOINPUT` we can make the C-side signature
>> `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
>> signature for a higher-fee version of HTLC-Timeout (assuming my cached
>> understanding of `SIGHASH_NOINPUT` still holds).
>> > >
>> > > With this, B can exponentially increase the fee as L+1 approaches.
>> > > If B can get HTLC-Timeout confirmed before L+1, then C cannot steal
>> the HTLC value at all, since the UTXO it could steal from has already been
>> spent.
>> > >
>> > > In particular, it does not seem to me that it is necessary to change
>> the hashlock-branch transaction of C at all, since this mechanism is enough
>> to sidestep the issue (as I understand it).
>> > > But it does point to a need to make HTLC-Timeout (and possibly
>> symmetrically, HTLC-Success) also fee-bumpable.
>> > >
>> > > Note as well that this does not require a mempool: B can run in
>> `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout
>> is not confirmed, feebump HTLC-Timeout.
>> > > In particular, HTLC-Timeout comes into play only if B broadcast its
>> own commitment transaction, and B *should* be aware that it did so ---
>> there is still no need for mempool monitoring here.
>> > >
>> > > Now, of course this only delays the war.
>> > > Let us now consider what C can do to ensure that the bidding war will
>> happen eventually.
>> > >
>> > > * C can bribe a miner to prevent HTLC-Timeout from confirming between
>> L and L+1.
>> > >   * Or in other words, this is a censorship attack.
>> > >     * The Bitcoin censorship-resistance model is that censored
>> transactions can be fee-bumped, which attracts non-censoring miners to try
>> their luck at mining and evict the censoring miner.
>> > >       * Thus, letting B bump the fee on HTLC-Timeout is precisely the
>> mechanism we need.
>> > >       * This sets up a bidding war between C requesting miners to
>> censor, vs. B requesting miners to confirm, but that only sets the stage
>> for a second bidding war later between C and B, thus C is at a
>> disadvantage: it has to bribe miners to censor continuously from L to L+1
>> *and* additional bribe miners to confirm its transaction after L+1, whereas
>> B can offer its bribe as being something that miners can claim now without
>> waiting after L+1.
>> > >
>> > > The issue of course is the additional output that bloats the UTXO set
>> and requires another transaction to claim later.
>> > > And if we have `SIGHASH_NOINPUT`, it seems to me that
>> Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out
>> HTLC can be claimed with a fee-bumpable transaction directly without
>> RBF-carve-out.
>> > > (As well, it seems to me that, if both nodes support doing so, a
>> Poon-Dryja channel can be upgraded, without onchain activity, to a
>> Decker-Russell-Osuntokun channel: sign a transaction spending the funding
>> tx to a txo that has been set up as Decker-Russell-Osuntokun, do not
>> broadcast that transaction, then revoke the latest Poon-Dryja commitment
>> transactions, then switch the mechanism over to Decker-Russell-Osuntokun;
>> you still need to monitor for previous Poon-Dryja commitment transactions,
>> but HTLCs now sidestep the issue under discussion here.)
>> > >
>> > > Regards,
>> > > ZmnSCPxj
>> > > _______________________________________________
>> > > bitcoin-dev mailing list
>> > > bitcoin-dev@lists.linuxfoundation.org
>> > > https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>>
>>
>>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Olaoluwa Osuntokun]

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Hi Z,

> It seems to me that, if my cached understanding that `<0>
> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding
> that to the hashlock branch (2 witness bytes, 0.5 weight) would be a
pretty
> low-weight mitigation against this attack.

I think this works...so they're forced to spend the output with a non-final
sequence number, meaning it *must* signal RBF. In this case, now it's the
timeout-er vs the success-er racing based on fee rate. If the honest party
(the
one trying to time out the HTLC) bids a fee rate higher (need to also
account
for the whole absolute fee replacement thing), then things should generally
work out in their favor.

-- Laolu


On Tue, Apr 21, 2020 at 11:08 PM ZmnSCPxj <ZmnSCPxj@protonmail.com> wrote:

> Good morning Laolu, Matt, and list,
>
>
> > >  * With `SIGHASH_NOINPUT` we can make the C-side signature
> > >  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> > >  signature for a higher-fee version of HTLC-Timeout (assuming my cached
> > >  understanding of `SIGHASH_NOINPUT` still holds).
> >
> > no_input isn't needed. With simply single+anyone can pay, then B can
> attach
> > a new input+output pair to increase the fees on their HTLC redemption
> > transaction. As you mention, they now enter into a race against this
> > malicious ndoe to bump up their fees in order to win over the other
> party.
>
> Right, right, that works as well.
>
> >
> > If the malicious node uses a non-RBF signalled transaction to sweep their
> > HTLC, then we enter into another level of race, but this time on the
> mempool
> > propagation level. However, if there exists a relay path to a miner
> running
> > full RBF, then B's higher fee rate spend will win over.
>
> Hmm.
>
> So basically:
>
> * B has no mempool, because it wants to reduce its costs and etc.
> * C broadcasts a non-RBF claim tx with low fee before A->B locktime (L+1).
> * B does not notice this tx because:
>   1.  The tx is too low fee to be put in a block.
>   2.  B has no mempool so it cannot see the tx being propagated over the
> P2P network.
> * B tries to broadcast higher-fee HTLC-timeout, but fails because it
> cannot replace a non-RBF tx.
> * After L+1, C contacts the miners off-band and offers fee payment by
> other means.
>
> It seems to me that, if my cached understanding that `<0>
> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding
> that to the hashlock branch (2 witness bytes, 0.5 weight) would be a pretty
> low-weight mitigation against this attack.
>
> So I think the combination below gives us good size:
>
> * The HTLC-Timeout signature from C is flagged with
> `OP_SINGLE|OP_ANYONECANPAY`.
>   * Normally, the HTLC-Timeout still deducts the fee from the value of the
> UTXO being spent.
>   * However, if B notices that the L+1 timeout is approaching, it can
> fee-bump HTLC-Timeout with some onchain funds, recreating its own signature
> but reusing the (still valid) C signature.
> * The hashlock branch in this case includes `<0> OP_CHECKSEQUENCEVERIFY`,
> preventing C from broadcasting a low-fee claim tx.
>
> This has the advantages:
>
> * B does not need a mempool still and can run in `blocksonly`.
> * The normal path is still the same as current behavior, we "only" add a
> new path where if the L+1 timeout is approaching we fee-bump the
> HTLC-Timeout.
> * Costs are pretty low:
>   * No need for extra RBF carve-out txo.
>   * Just two additional witness bytes in the hashlock branch.
> * No mempool rule changes needed, can be done with the P2P network of
> today.
>   * Probably still resilient even with future changes in mempool rules, as
> long as typical RBF behaviors still remain.
>
> Is my understanding correct?
>
> Regards,
> ZmnSCPxj
>
> >
> > -- Laolu
> >
> > On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <
> bitcoin-dev@lists.linuxfoundation.org> wrote:
> >
> > > Good morning Matt, and list,
> > >
> > > >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds,
> how, now?")
> > > >     =============================
> > > >
> > > >     You'll note that in the discussion of RBF pinning we were pretty
> broad, and that that discussion seems to in fact cover
> > > >     our HTLC outputs, at least when spent via (3) or (4). It does,
> and in fact this is a pretty severe issue in today's
> > > >     lightning protocol [2]. A lightning counterparty (C, who
> received the HTLC from B, who received it from A) today could,
> > > >     if B broadcasts the commitment transaction, spend an HTLC using
> the preimage with a low-fee, RBF-disabled transaction.
> > > >     After a few blocks, A could claim the HTLC from B via the
> timeout mechanism, and then after a few days, C could get the
> > > >     HTLC-claiming transaction mined via some out-of-band agreement
> with a small miner. This leaves B short the HTLC value.
> > >
> > > My (cached) understanding is that, since RBF is signalled using
> `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the
> requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
> > > Adding that clause (2 bytes in witness if my math is correct) to the
> hashlock branch may be sufficient to prevent C from making an RBF-disabled
> transaction.
> > >
> > > But then you mention out-of-band agreements with miners, which
> basically means the transaction might not be in the mempool at all, in
> which case the vulnerability is not really about RBF or relay, but sheer
> economics.
> > >
> > > The payment is A->B->C, and the HTLC A->B must have a larger timeout
> (L + 1) than the HTLC B->C (L), in abstract non-block units.
> > > The vulnerability you are describing means that the current time must
> now be L + 1 or greater ("A could claim the HTLC from B via the timeout
> mechanism", meaning the A->B HTLC has timed out already).
> > >
> > > If so, then the B->C transaction has already timed out in the past and
> can be claimed in two ways, either via B timeout branch or C hashlock
> branch.
> > > This sets up a game where B and C bid to miners to get their version
> of reality committed onchain.
> > > (We can neglect out-of-band agreements here; miners have the incentive
> to publicly leak such agreements so that other potential bidders can offer
> even higher fees for their versions of that transaction.)
> > >
> > > Before L+1, C has no incentive to bid, since placing any bid at all
> will leak the preimage, which B can then turn around and use to spend from
> A, and A and C cannot steal from B.
> > >
> > > Thus, B should ensure that *before* L+1, the HTLC-Timeout has been
> committed onchain, which outright prevents this bidding war from even
> starting.
> > >
> > > The issue then is that B is using a pre-signed HTLC-timeout, which is
> needed since it is its commitment tx that was broadcast.
> > > This prevents B from RBF-ing the HTLC-Timeout transaction.
> > >
> > > So what is needed is to allow B to add fees to HTLC-Timeout:
> > >
> > > * We can add an RBF carve-out output to HTLC-Timeout, at the cost of
> more blockspace.
> > > * With `SIGHASH_NOINPUT` we can make the C-side signature
> `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> signature for a higher-fee version of HTLC-Timeout (assuming my cached
> understanding of `SIGHASH_NOINPUT` still holds).
> > >
> > > With this, B can exponentially increase the fee as L+1 approaches.
> > > If B can get HTLC-Timeout confirmed before L+1, then C cannot steal
> the HTLC value at all, since the UTXO it could steal from has already been
> spent.
> > >
> > > In particular, it does not seem to me that it is necessary to change
> the hashlock-branch transaction of C at all, since this mechanism is enough
> to sidestep the issue (as I understand it).
> > > But it does point to a need to make HTLC-Timeout (and possibly
> symmetrically, HTLC-Success) also fee-bumpable.
> > >
> > > Note as well that this does not require a mempool: B can run in
> `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout
> is not confirmed, feebump HTLC-Timeout.
> > > In particular, HTLC-Timeout comes into play only if B broadcast its
> own commitment transaction, and B *should* be aware that it did so ---
> there is still no need for mempool monitoring here.
> > >
> > > Now, of course this only delays the war.
> > > Let us now consider what C can do to ensure that the bidding war will
> happen eventually.
> > >
> > > * C can bribe a miner to prevent HTLC-Timeout from confirming between
> L and L+1.
> > >   * Or in other words, this is a censorship attack.
> > >     * The Bitcoin censorship-resistance model is that censored
> transactions can be fee-bumped, which attracts non-censoring miners to try
> their luck at mining and evict the censoring miner.
> > >       * Thus, letting B bump the fee on HTLC-Timeout is precisely the
> mechanism we need.
> > >       * This sets up a bidding war between C requesting miners to
> censor, vs. B requesting miners to confirm, but that only sets the stage
> for a second bidding war later between C and B, thus C is at a
> disadvantage: it has to bribe miners to censor continuously from L to L+1
> *and* additional bribe miners to confirm its transaction after L+1, whereas
> B can offer its bribe as being something that miners can claim now without
> waiting after L+1.
> > >
> > > The issue of course is the additional output that bloats the UTXO set
> and requires another transaction to claim later.
> > > And if we have `SIGHASH_NOINPUT`, it seems to me that
> Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out
> HTLC can be claimed with a fee-bumpable transaction directly without
> RBF-carve-out.
> > > (As well, it seems to me that, if both nodes support doing so, a
> Poon-Dryja channel can be upgraded, without onchain activity, to a
> Decker-Russell-Osuntokun channel: sign a transaction spending the funding
> tx to a txo that has been set up as Decker-Russell-Osuntokun, do not
> broadcast that transaction, then revoke the latest Poon-Dryja commitment
> transactions, then switch the mechanism over to Decker-Russell-Osuntokun;
> you still need to monitor for previous Poon-Dryja commitment transactions,
> but HTLCs now sidestep the issue under discussion here.)
> > >
> > > Regards,
> > > ZmnSCPxj
> > > _______________________________________________
> > > bitcoin-dev mailing list
> > > bitcoin-dev@lists.linuxfoundation.org
> > > https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>
>
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Matt Corallo]

On 4/22/20 12:12 AM, ZmnSCPxj wrote:
> Good morning Matt, and list,
> 
> 
> 
>>     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds, how, now?")
>>     =============================
>>
>>     You'll note that in the discussion of RBF pinning we were pretty broad, and that that discussion seems to in fact cover
>>     our HTLC outputs, at least when spent via (3) or (4). It does, and in fact this is a pretty severe issue in today's
>>     lightning protocol [2]. A lightning counterparty (C, who received the HTLC from B, who received it from A) today could,
>>     if B broadcasts the commitment transaction, spend an HTLC using the preimage with a low-fee, RBF-disabled transaction.
>>     After a few blocks, A could claim the HTLC from B via the timeout mechanism, and then after a few days, C could get the
>>     HTLC-claiming transaction mined via some out-of-band agreement with a small miner. This leaves B short the HTLC value.
> 
> My (cached) understanding is that, since RBF is signalled using `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
> Adding that clause (2 bytes in witness if my math is correct) to the hashlock branch may be sufficient to prevent C from making an RBF-disabled transaction.

Hmm, indeed, though note that (IIRC) you can break this by adding children or parents which are *not* RBF-enabled and
then the package may lose the ability to be RBF'd.

> But then you mention out-of-band agreements with miners, which basically means the transaction might not be in the mempool at all, in which case the vulnerability is not really about RBF or relay, but sheer economics.

No. The whole point of this attack is that you keep a transaction in the mempool but unconfirmed via RBF pinning, which
prevents an *alternative* transaction from being confirmed. You then have plenty of time to go get it confirmed later.

> The payment is A->B->C, and the HTLC A->B must have a larger timeout (L + 1) than the HTLC B->C (L), in abstract non-block units.
> The vulnerability you are describing means that the current time must now be L + 1 or greater ("A could claim the HTLC from B via the timeout mechanism", meaning the A->B HTLC has timed out already).
> 
> If so, then the B->C transaction has already timed out in the past and can be claimed in two ways, either via B timeout branch or C hashlock branch.
> This sets up a game where B and C bid to miners to get their version of reality committed onchain.
> (We can neglect out-of-band agreements here; miners have the incentive to publicly leak such agreements so that other potential bidders can offer even higher fees for their versions of that transaction.)

Right, I think I didn't explain clearly enough. The point is that, here, B tries to broadcast the timeout transaction
but cannot because there is an in-mempool conflict.

> Before L+1, C has no incentive to bid, since placing any bid at all will leak the preimage, which B can then turn around and use to spend from A, and A and C cannot steal from B.
> 
> Thus, B should ensure that *before* L+1, the HTLC-Timeout has been committed onchain, which outright prevents this bidding war from even starting.
> 
> The issue then is that B is using a pre-signed HTLC-timeout, which is needed since it is its commitment tx that was broadcast.
> This prevents B from RBF-ing the HTLC-Timeout transaction.
> 
> So what is needed is to allow B to add fees to HTLC-Timeout:
> 
> * We can add an RBF carve-out output to HTLC-Timeout, at the cost of more blockspace.
> * With `SIGHASH_NOINPUT` we can make the C-side signature `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side signature for a higher-fee version of HTLC-Timeout (assuming my cached understanding of `SIGHASH_NOINPUT` still holds).

This does not solve the issue because you can add as many fees as you want, as long as the transaction is RBF-pinned,
there is not much you can do in an automated fashion.

> With this, B can exponentially increase the fee as L+1 approaches.
> If B can get HTLC-Timeout confirmed before L+1, then C cannot steal the HTLC value at all, since the UTXO it could steal from has already been spent.
> 
> In particular, it does not seem to me that it is necessary to change the hashlock-branch transaction of C at all, since this mechanism is enough to sidestep the issue (as I understand it).
> But it does point to a need to make HTLC-Timeout (and possibly symmetrically, HTLC-Success) also fee-bumpable.
> 
> Note as well that this does not require a mempool: B can run in `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout is not confirmed, feebump HTLC-Timeout.
> In particular, HTLC-Timeout comes into play only if B broadcast its own commitment transaction, and B *should* be aware that it did so --- there is still no need for mempool monitoring here.
> 
> 
> Now, of course this only delays the war.
> Let us now consider what C can do to ensure that the bidding war will happen eventually.
> 
> * C can bribe a miner to prevent HTLC-Timeout from confirming between L and L+1.
>   * Or in other words, this is a censorship attack.
>     * The Bitcoin censorship-resistance model is that censored transactions can be fee-bumped, which attracts non-censoring miners to try their luck at mining and evict the censoring miner.
>       * Thus, letting B bump the fee on HTLC-Timeout is precisely the mechanism we need.
>       * This sets up a bidding war between C requesting miners to censor, vs. B requesting miners to confirm, but that only sets the stage for a second bidding war later between C and B, thus C is at a disadvantage: it has to bribe miners to censor continuously from L to L+1 *and* additional bribe miners to confirm its transaction after L+1, whereas B can offer its bribe as being something that miners can claim now without waiting after L+1.
> 
> 
> 
> The issue of course is the additional output that bloats the UTXO set and requires another transaction to claim later.
> And if we have `SIGHASH_NOINPUT`, it seems to me that Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out HTLC can be claimed with a fee-bumpable transaction directly without RBF-carve-out.
> (As well, it seems to me that, if both nodes support doing so, a Poon-Dryja channel can be upgraded, without onchain activity, to a Decker-Russell-Osuntokun channel: sign a transaction spending the funding tx to a txo that has been set up as Decker-Russell-Osuntokun, do not broadcast that transaction, then revoke the latest Poon-Dryja commitment transactions, then switch the mechanism over to Decker-Russell-Osuntokun; you still need to monitor for previous Poon-Dryja commitment transactions, but HTLCs now sidestep the issue under discussion here.)
> 
> Regards,
> ZmnSCPxj
> 

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Bastien TEINTURIER]

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Hi Antoine and list,

Thanks for raising this. There's one step I'd like to understand further:

* Mallory can broadcast its Pinning Preimage Tx on offered HTLC #2 output
> on Alice's transaction,
> feerate is maliciously chosen to get in network mempools but never to
> confirm. Absolute fee must
> be higher than HTLC-timeout #2, a fact known to Mallory. There is no p2p
> race.
>

Can you detail how the "absolute fee" is computed here?
Doesn't that mean that if this had a higher fee than the htlc-timeout, and
the htlc-timeout fee was
chosen to confirm quickly (that's why we have an annoying `update_fee`),
the htlc-success will confirm
quickly (which makes the problem disappear)?
Because once the commit tx is confirmed, the "package" consists of only the
htlc-success, doesn't it?

I think the devil will be in the details here, so it's worth expanding on
the fee calculation imho.

Thanks!
Bastien

Le mer. 22 avr. 2020 à 10:01, Antoine Riard <antoine.riard@gmail.com> a
écrit :

> Personally, I would have wait a bit before to go public on this, like
> letting some implementations
> increasing their CLTV deltas, but anyway, it's here now.
>
> Mempool-pinning attacks were already discussed on this list [0], but what
> we found is you
> can _reverse_ the scenario, where it's not the malicious party delaying
> confirmation of honest
> party transactions but malicious deliberately stucking its own
> transactions in the mempool to avoid
> confirmation of timeout. And therefore gaming inter-link timelock to
> provoke an unbalanced
> settlement for the victim ("aka you pay forward, but don't get pay
> backward").
>
> How much attacks are practical is based on how you can leverage mempool
> rules to pin your own
> transaction. What you're looking for is a  _mempool-obstruction_ trick,
> i.e a way to get honest party
> transaction being bounce off due to your transaction being already there.
>
> Beyond disabling RBF on your transaction (with current protocol, not
> anchor proposal), there is
> two likely candidates:
> * BIP 125 rule 3: "The replacement transaction pays an absolute fee of at
> least the sum paid by the original transactions."
> * BIP 125 rule 5: "The number of original transactions to be replaced and
> their descendant transactions which will be evicted from the mempool must
> not exceed a total of 100 transactions."
>
> Let's go through whole scenario:
> * Mallory and Eve are colluding
> * Eve and Mallory are opening channels with Alice, Mallory do a bit of
> rebalancing
> to get full incoming capacity, like receiving funds on an onchain address
> through another Alice
> link
> * Eve send a HTLC #1 to Mallory through Alice expirying at block 100
> * Eve send a second HTLC #2 to Mallory through Alice, expirying at block
> 110 on outgoing link
> (A<->M), 120 on incoming link (E<->A)
> * Before block 100, without cancellation from Mallory, Alice will
> force-close channel and broadcast
> her local commitment and HTLC-timeout to get back HTLC #1
> * Alice can't broadcast HTLC-timeout for HTLC #2 as it's only expires at
> 110
> * Mallory can broadcast its Pinning Preimage Tx on offered HTLC #2 output
> on Alice's transaction,
> feerate is maliciously chosen to get in network mempools but never to
> confirm. Absolute fee must
> be higher than HTLC-timeout #2, a fact known to Mallory. There is no p2p
> race.
> * As Alice doesn't watch the mempool, she is never going to learn the
> preimage to redeeem incoming
> HTLC #2
> * At block 110, Alice is going to broadcast HTLC-timeout #2, feerate may
> be higher but as absolute
> fee is lower, it's going to be rejected from network mempools as
> replacement for Pinning Preimage
> Tx (BIP 125 rule 3)
> * At block 120, Eve closes channel and HTLC-timeout HTLC #2
> * Mallory can RBF its Pinning Preimage Tx by a high-feerate one and get it
> confirmed
>
> New anchor_output proposal, by disabling RBF, forces attacker to bid on
> the absolute fee. It may
> be now a risk to loose the fee if Pinning Tx is confirming. You may extend
> your "pinning
> lease" by ejecting your malicious tx, like conflicting or trimming out of
> the mempool one of its
> parents. And then reannounce your preimage tx with a
> lower-feerate-but-still-high-fee before a
> new block and a honest HTLC-timeout rebroadcast.
>
> AFAICT, even with anchor_output deployed, even assuming empty mempools,
> success rate and economic
> rationality of attacks is finding such cheap, reliable "pinning lease
> extension" trick.
>
> I think any mempool watching mitigation is at best a cat-and-mouse hack.
> Contrary to node
> advancing towards a global blockchain view thanks to PoW, network mempools
> don't have a convergence
> guarantee. This means,  in a distributed system like bitcoin, node don't
> see events in the same
> order, Alice may observe tx X, tx Y, tx Z and Bob may observe tx Z, tx X,
> tx Y. And order of events
> affects if a future event is going to be rejected or not, like if tx Z
> disable-RBF and tx X try to
> replace Z, Alice accepts X and Bob rejects it. And this divergence may
> perserve until a new block.
>
> Practically, it means an attacker can provoke a local conflict to bounce
> off HTLC preimage tx out
> of your mempool while broadcasting preimage tx without conflict to the
> rest of the network by
> tweaking tx-relay protocol and so easily manipulating order of events for
> every node. A local
> conflict is easy to provoke, just make tx A double-spent by both
> HTLC-preimage-tx and non-RBF-tx-B.
> Announce txA+txB to mempool victim and txA+HTLC-preimage-tx to rest of
> network. When rest of
> network announce HTLC-preimage-tx, it's going to rejected by your mempool.
>
> Provoking local conflict assumes of course _interlayer_ mapping by an
> attacker, i.e mapping your LN
> node to your full-node(s). Last time, we check, there was 982 match by IP
> for 4,500 LN/52,000
> full-node. Mapping heuristics is an ongoing research subject and sadly
> seems affordable.
>
> Yes a) you can enable full-RBF on your local node but blinding conflicting
> may still be with higher
> feerate as everything is attacker malleable b) you may want to catch tx
> and extract preimage
> on the p2p wire, but processing raw transaction would be such a DoS
> vector...
>
> Overall, I think we all agree on the long term direction to get a
> Contracting-Protocols-Enhanced
> mempool with a multiparty-safe-API, bundled with package relay deployment.
> Even if there is current
> move toward this direction, this may take longer than expected as with any
> critical-safety
> component in Core.
>
> A temporary fix could be to resuscitate old work to ensure peering through
> a full-RBF propagation path,
> but p2p implications are hard to gauge, like wouldn't guarantee p2p
> censorship resistance of this...
>
> It's quite a tangled issue, with a good deal of both bitcoin and lightning
> knowledge so feel free
> to verify and double-check more than usual
>
> Cheers
>
> [0]
> https://lists.linuxfoundation.org/pipermail/lightning-dev/2019-October/002240.html
>
> Le mer. 22 avr. 2020 à 02:08, ZmnSCPxj via bitcoin-dev <
> bitcoin-dev@lists.linuxfoundation.org> a écrit :
>
>> Good morning Laolu, Matt, and list,
>>
>>
>> > >  * With `SIGHASH_NOINPUT` we can make the C-side signature
>> > >  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
>> > >  signature for a higher-fee version of HTLC-Timeout (assuming my
>> cached
>> > >  understanding of `SIGHASH_NOINPUT` still holds).
>> >
>> > no_input isn't needed. With simply single+anyone can pay, then B can
>> attach
>> > a new input+output pair to increase the fees on their HTLC redemption
>> > transaction. As you mention, they now enter into a race against this
>> > malicious ndoe to bump up their fees in order to win over the other
>> party.
>>
>> Right, right, that works as well.
>>
>> >
>> > If the malicious node uses a non-RBF signalled transaction to sweep
>> their
>> > HTLC, then we enter into another level of race, but this time on the
>> mempool
>> > propagation level. However, if there exists a relay path to a miner
>> running
>> > full RBF, then B's higher fee rate spend will win over.
>>
>> Hmm.
>>
>> So basically:
>>
>> * B has no mempool, because it wants to reduce its costs and etc.
>> * C broadcasts a non-RBF claim tx with low fee before A->B locktime (L+1).
>> * B does not notice this tx because:
>>   1.  The tx is too low fee to be put in a block.
>>   2.  B has no mempool so it cannot see the tx being propagated over the
>> P2P network.
>> * B tries to broadcast higher-fee HTLC-timeout, but fails because it
>> cannot replace a non-RBF tx.
>> * After L+1, C contacts the miners off-band and offers fee payment by
>> other means.
>>
>> It seems to me that, if my cached understanding that `<0>
>> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding
>> that to the hashlock branch (2 witness bytes, 0.5 weight) would be a pretty
>> low-weight mitigation against this attack.
>>
>> So I think the combination below gives us good size:
>>
>> * The HTLC-Timeout signature from C is flagged with
>> `OP_SINGLE|OP_ANYONECANPAY`.
>>   * Normally, the HTLC-Timeout still deducts the fee from the value of
>> the UTXO being spent.
>>   * However, if B notices that the L+1 timeout is approaching, it can
>> fee-bump HTLC-Timeout with some onchain funds, recreating its own signature
>> but reusing the (still valid) C signature.
>> * The hashlock branch in this case includes `<0> OP_CHECKSEQUENCEVERIFY`,
>> preventing C from broadcasting a low-fee claim tx.
>>
>> This has the advantages:
>>
>> * B does not need a mempool still and can run in `blocksonly`.
>> * The normal path is still the same as current behavior, we "only" add a
>> new path where if the L+1 timeout is approaching we fee-bump the
>> HTLC-Timeout.
>> * Costs are pretty low:
>>   * No need for extra RBF carve-out txo.
>>   * Just two additional witness bytes in the hashlock branch.
>> * No mempool rule changes needed, can be done with the P2P network of
>> today.
>>   * Probably still resilient even with future changes in mempool rules,
>> as long as typical RBF behaviors still remain.
>>
>> Is my understanding correct?
>>
>> Regards,
>> ZmnSCPxj
>>
>> >
>> > -- Laolu
>> >
>> > On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <
>> bitcoin-dev@lists.linuxfoundation.org> wrote:
>> >
>> > > Good morning Matt, and list,
>> > >
>> > > >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal
>> funds, how, now?")
>> > > >     =============================
>> > > >
>> > > >     You'll note that in the discussion of RBF pinning we were
>> pretty broad, and that that discussion seems to in fact cover
>> > > >     our HTLC outputs, at least when spent via (3) or (4). It does,
>> and in fact this is a pretty severe issue in today's
>> > > >     lightning protocol [2]. A lightning counterparty (C, who
>> received the HTLC from B, who received it from A) today could,
>> > > >     if B broadcasts the commitment transaction, spend an HTLC using
>> the preimage with a low-fee, RBF-disabled transaction.
>> > > >     After a few blocks, A could claim the HTLC from B via the
>> timeout mechanism, and then after a few days, C could get the
>> > > >     HTLC-claiming transaction mined via some out-of-band agreement
>> with a small miner. This leaves B short the HTLC value.
>> > >
>> > > My (cached) understanding is that, since RBF is signalled using
>> `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the
>> requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
>> > > Adding that clause (2 bytes in witness if my math is correct) to the
>> hashlock branch may be sufficient to prevent C from making an RBF-disabled
>> transaction.
>> > >
>> > > But then you mention out-of-band agreements with miners, which
>> basically means the transaction might not be in the mempool at all, in
>> which case the vulnerability is not really about RBF or relay, but sheer
>> economics.
>> > >
>> > > The payment is A->B->C, and the HTLC A->B must have a larger timeout
>> (L + 1) than the HTLC B->C (L), in abstract non-block units.
>> > > The vulnerability you are describing means that the current time must
>> now be L + 1 or greater ("A could claim the HTLC from B via the timeout
>> mechanism", meaning the A->B HTLC has timed out already).
>> > >
>> > > If so, then the B->C transaction has already timed out in the past
>> and can be claimed in two ways, either via B timeout branch or C hashlock
>> branch.
>> > > This sets up a game where B and C bid to miners to get their version
>> of reality committed onchain.
>> > > (We can neglect out-of-band agreements here; miners have the
>> incentive to publicly leak such agreements so that other potential bidders
>> can offer even higher fees for their versions of that transaction.)
>> > >
>> > > Before L+1, C has no incentive to bid, since placing any bid at all
>> will leak the preimage, which B can then turn around and use to spend from
>> A, and A and C cannot steal from B.
>> > >
>> > > Thus, B should ensure that *before* L+1, the HTLC-Timeout has been
>> committed onchain, which outright prevents this bidding war from even
>> starting.
>> > >
>> > > The issue then is that B is using a pre-signed HTLC-timeout, which is
>> needed since it is its commitment tx that was broadcast.
>> > > This prevents B from RBF-ing the HTLC-Timeout transaction.
>> > >
>> > > So what is needed is to allow B to add fees to HTLC-Timeout:
>> > >
>> > > * We can add an RBF carve-out output to HTLC-Timeout, at the cost of
>> more blockspace.
>> > > * With `SIGHASH_NOINPUT` we can make the C-side signature
>> `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
>> signature for a higher-fee version of HTLC-Timeout (assuming my cached
>> understanding of `SIGHASH_NOINPUT` still holds).
>> > >
>> > > With this, B can exponentially increase the fee as L+1 approaches.
>> > > If B can get HTLC-Timeout confirmed before L+1, then C cannot steal
>> the HTLC value at all, since the UTXO it could steal from has already been
>> spent.
>> > >
>> > > In particular, it does not seem to me that it is necessary to change
>> the hashlock-branch transaction of C at all, since this mechanism is enough
>> to sidestep the issue (as I understand it).
>> > > But it does point to a need to make HTLC-Timeout (and possibly
>> symmetrically, HTLC-Success) also fee-bumpable.
>> > >
>> > > Note as well that this does not require a mempool: B can run in
>> `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout
>> is not confirmed, feebump HTLC-Timeout.
>> > > In particular, HTLC-Timeout comes into play only if B broadcast its
>> own commitment transaction, and B *should* be aware that it did so ---
>> there is still no need for mempool monitoring here.
>> > >
>> > > Now, of course this only delays the war.
>> > > Let us now consider what C can do to ensure that the bidding war will
>> happen eventually.
>> > >
>> > > * C can bribe a miner to prevent HTLC-Timeout from confirming between
>> L and L+1.
>> > >   * Or in other words, this is a censorship attack.
>> > >     * The Bitcoin censorship-resistance model is that censored
>> transactions can be fee-bumped, which attracts non-censoring miners to try
>> their luck at mining and evict the censoring miner.
>> > >       * Thus, letting B bump the fee on HTLC-Timeout is precisely the
>> mechanism we need.
>> > >       * This sets up a bidding war between C requesting miners to
>> censor, vs. B requesting miners to confirm, but that only sets the stage
>> for a second bidding war later between C and B, thus C is at a
>> disadvantage: it has to bribe miners to censor continuously from L to L+1
>> *and* additional bribe miners to confirm its transaction after L+1, whereas
>> B can offer its bribe as being something that miners can claim now without
>> waiting after L+1.
>> > >
>> > > The issue of course is the additional output that bloats the UTXO set
>> and requires another transaction to claim later.
>> > > And if we have `SIGHASH_NOINPUT`, it seems to me that
>> Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out
>> HTLC can be claimed with a fee-bumpable transaction directly without
>> RBF-carve-out.
>> > > (As well, it seems to me that, if both nodes support doing so, a
>> Poon-Dryja channel can be upgraded, without onchain activity, to a
>> Decker-Russell-Osuntokun channel: sign a transaction spending the funding
>> tx to a txo that has been set up as Decker-Russell-Osuntokun, do not
>> broadcast that transaction, then revoke the latest Poon-Dryja commitment
>> transactions, then switch the mechanism over to Decker-Russell-Osuntokun;
>> you still need to monitor for previous Poon-Dryja commitment transactions,
>> but HTLCs now sidestep the issue under discussion here.)
>> > >
>> > > Regards,
>> > > ZmnSCPxj
>> > > _______________________________________________
>> > > bitcoin-dev mailing list
>> > > bitcoin-dev@lists.linuxfoundation.org
>> > > https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>>
>>
>> _______________________________________________
>> bitcoin-dev mailing list
>> bitcoin-dev@lists.linuxfoundation.org
>> https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>>
> _______________________________________________
> Lightning-dev mailing list
> Lightning-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/lightning-dev
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Antoine Riard]

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Personally, I would have wait a bit before to go public on this, like
letting some implementations
increasing their CLTV deltas, but anyway, it's here now.

Mempool-pinning attacks were already discussed on this list [0], but what
we found is you
can _reverse_ the scenario, where it's not the malicious party delaying
confirmation of honest
party transactions but malicious deliberately stucking its own transactions
in the mempool to avoid
confirmation of timeout. And therefore gaming inter-link timelock to
provoke an unbalanced
settlement for the victim ("aka you pay forward, but don't get pay
backward").

How much attacks are practical is based on how you can leverage mempool
rules to pin your own
transaction. What you're looking for is a  _mempool-obstruction_ trick, i.e
a way to get honest party
transaction being bounce off due to your transaction being already there.

Beyond disabling RBF on your transaction (with current protocol, not anchor
proposal), there is
two likely candidates:
* BIP 125 rule 3: "The replacement transaction pays an absolute fee of at
least the sum paid by the original transactions."
* BIP 125 rule 5: "The number of original transactions to be replaced and
their descendant transactions which will be evicted from the mempool must
not exceed a total of 100 transactions."

Let's go through whole scenario:
* Mallory and Eve are colluding
* Eve and Mallory are opening channels with Alice, Mallory do a bit of
rebalancing
to get full incoming capacity, like receiving funds on an onchain address
through another Alice
link
* Eve send a HTLC #1 to Mallory through Alice expirying at block 100
* Eve send a second HTLC #2 to Mallory through Alice, expirying at block
110 on outgoing link
(A<->M), 120 on incoming link (E<->A)
* Before block 100, without cancellation from Mallory, Alice will
force-close channel and broadcast
her local commitment and HTLC-timeout to get back HTLC #1
* Alice can't broadcast HTLC-timeout for HTLC #2 as it's only expires at 110
* Mallory can broadcast its Pinning Preimage Tx on offered HTLC #2 output
on Alice's transaction,
feerate is maliciously chosen to get in network mempools but never to
confirm. Absolute fee must
be higher than HTLC-timeout #2, a fact known to Mallory. There is no p2p
race.
* As Alice doesn't watch the mempool, she is never going to learn the
preimage to redeeem incoming
HTLC #2
* At block 110, Alice is going to broadcast HTLC-timeout #2, feerate may be
higher but as absolute
fee is lower, it's going to be rejected from network mempools as
replacement for Pinning Preimage
Tx (BIP 125 rule 3)
* At block 120, Eve closes channel and HTLC-timeout HTLC #2
* Mallory can RBF its Pinning Preimage Tx by a high-feerate one and get it
confirmed

New anchor_output proposal, by disabling RBF, forces attacker to bid on the
absolute fee. It may
be now a risk to loose the fee if Pinning Tx is confirming. You may extend
your "pinning
lease" by ejecting your malicious tx, like conflicting or trimming out of
the mempool one of its
parents. And then reannounce your preimage tx with a
lower-feerate-but-still-high-fee before a
new block and a honest HTLC-timeout rebroadcast.

AFAICT, even with anchor_output deployed, even assuming empty mempools,
success rate and economic
rationality of attacks is finding such cheap, reliable "pinning lease
extension" trick.

I think any mempool watching mitigation is at best a cat-and-mouse hack.
Contrary to node
advancing towards a global blockchain view thanks to PoW, network mempools
don't have a convergence
guarantee. This means,  in a distributed system like bitcoin, node don't
see events in the same
order, Alice may observe tx X, tx Y, tx Z and Bob may observe tx Z, tx X,
tx Y. And order of events
affects if a future event is going to be rejected or not, like if tx Z
disable-RBF and tx X try to
replace Z, Alice accepts X and Bob rejects it. And this divergence may
perserve until a new block.

Practically, it means an attacker can provoke a local conflict to bounce
off HTLC preimage tx out
of your mempool while broadcasting preimage tx without conflict to the rest
of the network by
tweaking tx-relay protocol and so easily manipulating order of events for
every node. A local
conflict is easy to provoke, just make tx A double-spent by both
HTLC-preimage-tx and non-RBF-tx-B.
Announce txA+txB to mempool victim and txA+HTLC-preimage-tx to rest of
network. When rest of
network announce HTLC-preimage-tx, it's going to rejected by your mempool.

Provoking local conflict assumes of course _interlayer_ mapping by an
attacker, i.e mapping your LN
node to your full-node(s). Last time, we check, there was 982 match by IP
for 4,500 LN/52,000
full-node. Mapping heuristics is an ongoing research subject and sadly
seems affordable.

Yes a) you can enable full-RBF on your local node but blinding conflicting
may still be with higher
feerate as everything is attacker malleable b) you may want to catch tx and
extract preimage
on the p2p wire, but processing raw transaction would be such a DoS
vector...

Overall, I think we all agree on the long term direction to get a
Contracting-Protocols-Enhanced
mempool with a multiparty-safe-API, bundled with package relay deployment.
Even if there is current
move toward this direction, this may take longer than expected as with any
critical-safety
component in Core.

A temporary fix could be to resuscitate old work to ensure peering through
a full-RBF propagation path,
but p2p implications are hard to gauge, like wouldn't guarantee p2p
censorship resistance of this...

It's quite a tangled issue, with a good deal of both bitcoin and lightning
knowledge so feel free
to verify and double-check more than usual

Cheers

[0]
https://lists.linuxfoundation.org/pipermail/lightning-dev/2019-October/002240.html

Le mer. 22 avr. 2020 à 02:08, ZmnSCPxj via bitcoin-dev <
bitcoin-dev@lists.linuxfoundation.org> a écrit :

> Good morning Laolu, Matt, and list,
>
>
> > >  * With `SIGHASH_NOINPUT` we can make the C-side signature
> > >  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> > >  signature for a higher-fee version of HTLC-Timeout (assuming my cached
> > >  understanding of `SIGHASH_NOINPUT` still holds).
> >
> > no_input isn't needed. With simply single+anyone can pay, then B can
> attach
> > a new input+output pair to increase the fees on their HTLC redemption
> > transaction. As you mention, they now enter into a race against this
> > malicious ndoe to bump up their fees in order to win over the other
> party.
>
> Right, right, that works as well.
>
> >
> > If the malicious node uses a non-RBF signalled transaction to sweep their
> > HTLC, then we enter into another level of race, but this time on the
> mempool
> > propagation level. However, if there exists a relay path to a miner
> running
> > full RBF, then B's higher fee rate spend will win over.
>
> Hmm.
>
> So basically:
>
> * B has no mempool, because it wants to reduce its costs and etc.
> * C broadcasts a non-RBF claim tx with low fee before A->B locktime (L+1).
> * B does not notice this tx because:
>   1.  The tx is too low fee to be put in a block.
>   2.  B has no mempool so it cannot see the tx being propagated over the
> P2P network.
> * B tries to broadcast higher-fee HTLC-timeout, but fails because it
> cannot replace a non-RBF tx.
> * After L+1, C contacts the miners off-band and offers fee payment by
> other means.
>
> It seems to me that, if my cached understanding that `<0>
> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding
> that to the hashlock branch (2 witness bytes, 0.5 weight) would be a pretty
> low-weight mitigation against this attack.
>
> So I think the combination below gives us good size:
>
> * The HTLC-Timeout signature from C is flagged with
> `OP_SINGLE|OP_ANYONECANPAY`.
>   * Normally, the HTLC-Timeout still deducts the fee from the value of the
> UTXO being spent.
>   * However, if B notices that the L+1 timeout is approaching, it can
> fee-bump HTLC-Timeout with some onchain funds, recreating its own signature
> but reusing the (still valid) C signature.
> * The hashlock branch in this case includes `<0> OP_CHECKSEQUENCEVERIFY`,
> preventing C from broadcasting a low-fee claim tx.
>
> This has the advantages:
>
> * B does not need a mempool still and can run in `blocksonly`.
> * The normal path is still the same as current behavior, we "only" add a
> new path where if the L+1 timeout is approaching we fee-bump the
> HTLC-Timeout.
> * Costs are pretty low:
>   * No need for extra RBF carve-out txo.
>   * Just two additional witness bytes in the hashlock branch.
> * No mempool rule changes needed, can be done with the P2P network of
> today.
>   * Probably still resilient even with future changes in mempool rules, as
> long as typical RBF behaviors still remain.
>
> Is my understanding correct?
>
> Regards,
> ZmnSCPxj
>
> >
> > -- Laolu
> >
> > On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <
> bitcoin-dev@lists.linuxfoundation.org> wrote:
> >
> > > Good morning Matt, and list,
> > >
> > > >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds,
> how, now?")
> > > >     =============================
> > > >
> > > >     You'll note that in the discussion of RBF pinning we were pretty
> broad, and that that discussion seems to in fact cover
> > > >     our HTLC outputs, at least when spent via (3) or (4). It does,
> and in fact this is a pretty severe issue in today's
> > > >     lightning protocol [2]. A lightning counterparty (C, who
> received the HTLC from B, who received it from A) today could,
> > > >     if B broadcasts the commitment transaction, spend an HTLC using
> the preimage with a low-fee, RBF-disabled transaction.
> > > >     After a few blocks, A could claim the HTLC from B via the
> timeout mechanism, and then after a few days, C could get the
> > > >     HTLC-claiming transaction mined via some out-of-band agreement
> with a small miner. This leaves B short the HTLC value.
> > >
> > > My (cached) understanding is that, since RBF is signalled using
> `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the
> requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
> > > Adding that clause (2 bytes in witness if my math is correct) to the
> hashlock branch may be sufficient to prevent C from making an RBF-disabled
> transaction.
> > >
> > > But then you mention out-of-band agreements with miners, which
> basically means the transaction might not be in the mempool at all, in
> which case the vulnerability is not really about RBF or relay, but sheer
> economics.
> > >
> > > The payment is A->B->C, and the HTLC A->B must have a larger timeout
> (L + 1) than the HTLC B->C (L), in abstract non-block units.
> > > The vulnerability you are describing means that the current time must
> now be L + 1 or greater ("A could claim the HTLC from B via the timeout
> mechanism", meaning the A->B HTLC has timed out already).
> > >
> > > If so, then the B->C transaction has already timed out in the past and
> can be claimed in two ways, either via B timeout branch or C hashlock
> branch.
> > > This sets up a game where B and C bid to miners to get their version
> of reality committed onchain.
> > > (We can neglect out-of-band agreements here; miners have the incentive
> to publicly leak such agreements so that other potential bidders can offer
> even higher fees for their versions of that transaction.)
> > >
> > > Before L+1, C has no incentive to bid, since placing any bid at all
> will leak the preimage, which B can then turn around and use to spend from
> A, and A and C cannot steal from B.
> > >
> > > Thus, B should ensure that *before* L+1, the HTLC-Timeout has been
> committed onchain, which outright prevents this bidding war from even
> starting.
> > >
> > > The issue then is that B is using a pre-signed HTLC-timeout, which is
> needed since it is its commitment tx that was broadcast.
> > > This prevents B from RBF-ing the HTLC-Timeout transaction.
> > >
> > > So what is needed is to allow B to add fees to HTLC-Timeout:
> > >
> > > * We can add an RBF carve-out output to HTLC-Timeout, at the cost of
> more blockspace.
> > > * With `SIGHASH_NOINPUT` we can make the C-side signature
> `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> signature for a higher-fee version of HTLC-Timeout (assuming my cached
> understanding of `SIGHASH_NOINPUT` still holds).
> > >
> > > With this, B can exponentially increase the fee as L+1 approaches.
> > > If B can get HTLC-Timeout confirmed before L+1, then C cannot steal
> the HTLC value at all, since the UTXO it could steal from has already been
> spent.
> > >
> > > In particular, it does not seem to me that it is necessary to change
> the hashlock-branch transaction of C at all, since this mechanism is enough
> to sidestep the issue (as I understand it).
> > > But it does point to a need to make HTLC-Timeout (and possibly
> symmetrically, HTLC-Success) also fee-bumpable.
> > >
> > > Note as well that this does not require a mempool: B can run in
> `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout
> is not confirmed, feebump HTLC-Timeout.
> > > In particular, HTLC-Timeout comes into play only if B broadcast its
> own commitment transaction, and B *should* be aware that it did so ---
> there is still no need for mempool monitoring here.
> > >
> > > Now, of course this only delays the war.
> > > Let us now consider what C can do to ensure that the bidding war will
> happen eventually.
> > >
> > > * C can bribe a miner to prevent HTLC-Timeout from confirming between
> L and L+1.
> > >   * Or in other words, this is a censorship attack.
> > >     * The Bitcoin censorship-resistance model is that censored
> transactions can be fee-bumped, which attracts non-censoring miners to try
> their luck at mining and evict the censoring miner.
> > >       * Thus, letting B bump the fee on HTLC-Timeout is precisely the
> mechanism we need.
> > >       * This sets up a bidding war between C requesting miners to
> censor, vs. B requesting miners to confirm, but that only sets the stage
> for a second bidding war later between C and B, thus C is at a
> disadvantage: it has to bribe miners to censor continuously from L to L+1
> *and* additional bribe miners to confirm its transaction after L+1, whereas
> B can offer its bribe as being something that miners can claim now without
> waiting after L+1.
> > >
> > > The issue of course is the additional output that bloats the UTXO set
> and requires another transaction to claim later.
> > > And if we have `SIGHASH_NOINPUT`, it seems to me that
> Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out
> HTLC can be claimed with a fee-bumpable transaction directly without
> RBF-carve-out.
> > > (As well, it seems to me that, if both nodes support doing so, a
> Poon-Dryja channel can be upgraded, without onchain activity, to a
> Decker-Russell-Osuntokun channel: sign a transaction spending the funding
> tx to a txo that has been set up as Decker-Russell-Osuntokun, do not
> broadcast that transaction, then revoke the latest Poon-Dryja commitment
> transactions, then switch the mechanism over to Decker-Russell-Osuntokun;
> you still need to monitor for previous Poon-Dryja commitment transactions,
> but HTLCs now sidestep the issue under discussion here.)
> > >
> > > Regards,
> > > ZmnSCPxj
> > > _______________________________________________
> > > bitcoin-dev mailing list
> > > bitcoin-dev@lists.linuxfoundation.org
> > > https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>
>
> _______________________________________________
> bitcoin-dev mailing list
> bitcoin-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>

[-- Attachment #2: Type: text/html, Size: 18029 bytes --]

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning Laolu, Matt, and list,


> >  * With `SIGHASH_NOINPUT` we can make the C-side signature
> >  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> >  signature for a higher-fee version of HTLC-Timeout (assuming my cached
> >  understanding of `SIGHASH_NOINPUT` still holds).
>
> no_input isn't needed. With simply single+anyone can pay, then B can attach
> a new input+output pair to increase the fees on their HTLC redemption
> transaction. As you mention, they now enter into a race against this
> malicious ndoe to bump up their fees in order to win over the other party.

Right, right, that works as well.

>
> If the malicious node uses a non-RBF signalled transaction to sweep their
> HTLC, then we enter into another level of race, but this time on the mempool
> propagation level. However, if there exists a relay path to a miner running
> full RBF, then B's higher fee rate spend will win over.

Hmm.

So basically:

* B has no mempool, because it wants to reduce its costs and etc.
* C broadcasts a non-RBF claim tx with low fee before A->B locktime (L+1).
* B does not notice this tx because:
  1.  The tx is too low fee to be put in a block.
  2.  B has no mempool so it cannot see the tx being propagated over the P2P network.
* B tries to broadcast higher-fee HTLC-timeout, but fails because it cannot replace a non-RBF tx.
* After L+1, C contacts the miners off-band and offers fee payment by other means.

It seems to me that, if my cached understanding that `<0> OP_CHECKSEQUENCEVERIFY` is sufficient to require RBF-flagging, then adding that to the hashlock branch (2 witness bytes, 0.5 weight) would be a pretty low-weight mitigation against this attack.

So I think the combination below gives us good size:

* The HTLC-Timeout signature from C is flagged with `OP_SINGLE|OP_ANYONECANPAY`.
  * Normally, the HTLC-Timeout still deducts the fee from the value of the UTXO being spent.
  * However, if B notices that the L+1 timeout is approaching, it can fee-bump HTLC-Timeout with some onchain funds, recreating its own signature but reusing the (still valid) C signature.
* The hashlock branch in this case includes `<0> OP_CHECKSEQUENCEVERIFY`, preventing C from broadcasting a low-fee claim tx.

This has the advantages:

* B does not need a mempool still and can run in `blocksonly`.
* The normal path is still the same as current behavior, we "only" add a new path where if the L+1 timeout is approaching we fee-bump the HTLC-Timeout.
* Costs are pretty low:
  * No need for extra RBF carve-out txo.
  * Just two additional witness bytes in the hashlock branch.
* No mempool rule changes needed, can be done with the P2P network of today.
  * Probably still resilient even with future changes in mempool rules, as long as typical RBF behaviors still remain.

Is my understanding correct?

Regards,
ZmnSCPxj

>
> -- Laolu
>
> On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <bitcoin-dev@lists.linuxfoundation.org> wrote:
>
> > Good morning Matt, and list,
> >
> > >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds, how, now?")
> > >     =============================
> > >
> > >     You'll note that in the discussion of RBF pinning we were pretty broad, and that that discussion seems to in fact cover
> > >     our HTLC outputs, at least when spent via (3) or (4). It does, and in fact this is a pretty severe issue in today's
> > >     lightning protocol [2]. A lightning counterparty (C, who received the HTLC from B, who received it from A) today could,
> > >     if B broadcasts the commitment transaction, spend an HTLC using the preimage with a low-fee, RBF-disabled transaction.
> > >     After a few blocks, A could claim the HTLC from B via the timeout mechanism, and then after a few days, C could get the
> > >     HTLC-claiming transaction mined via some out-of-band agreement with a small miner. This leaves B short the HTLC value.
> >
> > My (cached) understanding is that, since RBF is signalled using `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
> > Adding that clause (2 bytes in witness if my math is correct) to the hashlock branch may be sufficient to prevent C from making an RBF-disabled transaction.
> >
> > But then you mention out-of-band agreements with miners, which basically means the transaction might not be in the mempool at all, in which case the vulnerability is not really about RBF or relay, but sheer economics.
> >
> > The payment is A->B->C, and the HTLC A->B must have a larger timeout (L + 1) than the HTLC B->C (L), in abstract non-block units.
> > The vulnerability you are describing means that the current time must now be L + 1 or greater ("A could claim the HTLC from B via the timeout mechanism", meaning the A->B HTLC has timed out already).
> >
> > If so, then the B->C transaction has already timed out in the past and can be claimed in two ways, either via B timeout branch or C hashlock branch.
> > This sets up a game where B and C bid to miners to get their version of reality committed onchain.
> > (We can neglect out-of-band agreements here; miners have the incentive to publicly leak such agreements so that other potential bidders can offer even higher fees for their versions of that transaction.)
> >
> > Before L+1, C has no incentive to bid, since placing any bid at all will leak the preimage, which B can then turn around and use to spend from A, and A and C cannot steal from B.
> >
> > Thus, B should ensure that *before* L+1, the HTLC-Timeout has been committed onchain, which outright prevents this bidding war from even starting.
> >
> > The issue then is that B is using a pre-signed HTLC-timeout, which is needed since it is its commitment tx that was broadcast.
> > This prevents B from RBF-ing the HTLC-Timeout transaction.
> >
> > So what is needed is to allow B to add fees to HTLC-Timeout:
> >
> > * We can add an RBF carve-out output to HTLC-Timeout, at the cost of more blockspace.
> > * With `SIGHASH_NOINPUT` we can make the C-side signature `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side signature for a higher-fee version of HTLC-Timeout (assuming my cached understanding of `SIGHASH_NOINPUT` still holds).
> >
> > With this, B can exponentially increase the fee as L+1 approaches.
> > If B can get HTLC-Timeout confirmed before L+1, then C cannot steal the HTLC value at all, since the UTXO it could steal from has already been spent.
> >
> > In particular, it does not seem to me that it is necessary to change the hashlock-branch transaction of C at all, since this mechanism is enough to sidestep the issue (as I understand it).
> > But it does point to a need to make HTLC-Timeout (and possibly symmetrically, HTLC-Success) also fee-bumpable.
> >
> > Note as well that this does not require a mempool: B can run in `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout is not confirmed, feebump HTLC-Timeout.
> > In particular, HTLC-Timeout comes into play only if B broadcast its own commitment transaction, and B *should* be aware that it did so --- there is still no need for mempool monitoring here.
> >
> > Now, of course this only delays the war.
> > Let us now consider what C can do to ensure that the bidding war will happen eventually.
> >
> > * C can bribe a miner to prevent HTLC-Timeout from confirming between L and L+1.
> >   * Or in other words, this is a censorship attack.
> >     * The Bitcoin censorship-resistance model is that censored transactions can be fee-bumped, which attracts non-censoring miners to try their luck at mining and evict the censoring miner.
> >       * Thus, letting B bump the fee on HTLC-Timeout is precisely the mechanism we need.
> >       * This sets up a bidding war between C requesting miners to censor, vs. B requesting miners to confirm, but that only sets the stage for a second bidding war later between C and B, thus C is at a disadvantage: it has to bribe miners to censor continuously from L to L+1 *and* additional bribe miners to confirm its transaction after L+1, whereas B can offer its bribe as being something that miners can claim now without waiting after L+1.
> >
> > The issue of course is the additional output that bloats the UTXO set and requires another transaction to claim later.
> > And if we have `SIGHASH_NOINPUT`, it seems to me that Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out HTLC can be claimed with a fee-bumpable transaction directly without RBF-carve-out.
> > (As well, it seems to me that, if both nodes support doing so, a Poon-Dryja channel can be upgraded, without onchain activity, to a Decker-Russell-Osuntokun channel: sign a transaction spending the funding tx to a txo that has been set up as Decker-Russell-Osuntokun, do not broadcast that transaction, then revoke the latest Poon-Dryja commitment transactions, then switch the mechanism over to Decker-Russell-Osuntokun; you still need to monitor for previous Poon-Dryja commitment transactions, but HTLCs now sidestep the issue under discussion here.)
> >
> > Regards,
> > ZmnSCPxj
> > _______________________________________________
> > bitcoin-dev mailing list
> > bitcoin-dev@lists.linuxfoundation.org
> > https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev

Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[Olaoluwa Osuntokun]

[-- Attachment #1: Type: text/plain, Size: 7460 bytes --]

> So what is needed is to allow B to add fees to HTLC-Timeout:

Indeed, anchors as defined in #lightning-rfc/688 allows this.

>  * With `SIGHASH_NOINPUT` we can make the C-side signature
>  `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
>  signature for a higher-fee version of HTLC-Timeout (assuming my cached
>  understanding of `SIGHASH_NOINPUT` still holds).

no_input isn't needed. With simply single+anyone can pay, then B can attach
a new input+output pair to increase the fees on their HTLC redemption
transaction. As you mention, they now enter into a race against this
malicious ndoe to bump up their fees in order to win over the other party.

If the malicious node uses a non-RBF signalled transaction to sweep their
HTLC, then we enter into another level of race, but this time on the mempool
propagation level. However, if there exists a relay path to a miner running
full RBF, then B's higher fee rate spend will win over.

-- Laolu

On Tue, Apr 21, 2020 at 9:13 PM ZmnSCPxj via bitcoin-dev <
bitcoin-dev@lists.linuxfoundation.org> wrote:

> Good morning Matt, and list,
>
>
>
> >     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds,
> how, now?")
> >     =============================
> >
> >     You'll note that in the discussion of RBF pinning we were pretty
> broad, and that that discussion seems to in fact cover
> >     our HTLC outputs, at least when spent via (3) or (4). It does, and
> in fact this is a pretty severe issue in today's
> >     lightning protocol [2]. A lightning counterparty (C, who received
> the HTLC from B, who received it from A) today could,
> >     if B broadcasts the commitment transaction, spend an HTLC using the
> preimage with a low-fee, RBF-disabled transaction.
> >     After a few blocks, A could claim the HTLC from B via the timeout
> mechanism, and then after a few days, C could get the
> >     HTLC-claiming transaction mined via some out-of-band agreement with
> a small miner. This leaves B short the HTLC value.
>
> My (cached) understanding is that, since RBF is signalled using
> `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the
> requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
> Adding that clause (2 bytes in witness if my math is correct) to the
> hashlock branch may be sufficient to prevent C from making an RBF-disabled
> transaction.
>
> But then you mention out-of-band agreements with miners, which basically
> means the transaction might not be in the mempool at all, in which case the
> vulnerability is not really about RBF or relay, but sheer economics.
>
> The payment is A->B->C, and the HTLC A->B must have a larger timeout (L +
> 1) than the HTLC B->C (L), in abstract non-block units.
> The vulnerability you are describing means that the current time must now
> be L + 1 or greater ("A could claim the HTLC from B via the timeout
> mechanism", meaning the A->B HTLC has timed out already).
>
> If so, then the B->C transaction has already timed out in the past and can
> be claimed in two ways, either via B timeout branch or C hashlock branch.
> This sets up a game where B and C bid to miners to get their version of
> reality committed onchain.
> (We can neglect out-of-band agreements here; miners have the incentive to
> publicly leak such agreements so that other potential bidders can offer
> even higher fees for their versions of that transaction.)
>
> Before L+1, C has no incentive to bid, since placing any bid at all will
> leak the preimage, which B can then turn around and use to spend from A,
> and A and C cannot steal from B.
>
> Thus, B should ensure that *before* L+1, the HTLC-Timeout has been
> committed onchain, which outright prevents this bidding war from even
> starting.
>
> The issue then is that B is using a pre-signed HTLC-timeout, which is
> needed since it is its commitment tx that was broadcast.
> This prevents B from RBF-ing the HTLC-Timeout transaction.
>
> So what is needed is to allow B to add fees to HTLC-Timeout:
>
> * We can add an RBF carve-out output to HTLC-Timeout, at the cost of more
> blockspace.
> * With `SIGHASH_NOINPUT` we can make the C-side signature
> `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side
> signature for a higher-fee version of HTLC-Timeout (assuming my cached
> understanding of `SIGHASH_NOINPUT` still holds).
>
> With this, B can exponentially increase the fee as L+1 approaches.
> If B can get HTLC-Timeout confirmed before L+1, then C cannot steal the
> HTLC value at all, since the UTXO it could steal from has already been
> spent.
>
> In particular, it does not seem to me that it is necessary to change the
> hashlock-branch transaction of C at all, since this mechanism is enough to
> sidestep the issue (as I understand it).
> But it does point to a need to make HTLC-Timeout (and possibly
> symmetrically, HTLC-Success) also fee-bumpable.
>
> Note as well that this does not require a mempool: B can run in
> `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout
> is not confirmed, feebump HTLC-Timeout.
> In particular, HTLC-Timeout comes into play only if B broadcast its own
> commitment transaction, and B *should* be aware that it did so --- there is
> still no need for mempool monitoring here.
>
>
> Now, of course this only delays the war.
> Let us now consider what C can do to ensure that the bidding war will
> happen eventually.
>
> * C can bribe a miner to prevent HTLC-Timeout from confirming between L
> and L+1.
>   * Or in other words, this is a censorship attack.
>     * The Bitcoin censorship-resistance model is that censored
> transactions can be fee-bumped, which attracts non-censoring miners to try
> their luck at mining and evict the censoring miner.
>       * Thus, letting B bump the fee on HTLC-Timeout is precisely the
> mechanism we need.
>       * This sets up a bidding war between C requesting miners to censor,
> vs. B requesting miners to confirm, but that only sets the stage for a
> second bidding war later between C and B, thus C is at a disadvantage: it
> has to bribe miners to censor continuously from L to L+1 *and* additional
> bribe miners to confirm its transaction after L+1, whereas B can offer its
> bribe as being something that miners can claim now without waiting after
> L+1.
>
>
>
> The issue of course is the additional output that bloats the UTXO set and
> requires another transaction to claim later.
> And if we have `SIGHASH_NOINPUT`, it seems to me that
> Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out
> HTLC can be claimed with a fee-bumpable transaction directly without
> RBF-carve-out.
> (As well, it seems to me that, if both nodes support doing so, a
> Poon-Dryja channel can be upgraded, without onchain activity, to a
> Decker-Russell-Osuntokun channel: sign a transaction spending the funding
> tx to a txo that has been set up as Decker-Russell-Osuntokun, do not
> broadcast that transaction, then revoke the latest Poon-Dryja commitment
> transactions, then switch the mechanism over to Decker-Russell-Osuntokun;
> you still need to monitor for previous Poon-Dryja commitment transactions,
> but HTLCs now sidestep the issue under discussion here.)
>
> Regards,
> ZmnSCPxj
> _______________________________________________
> bitcoin-dev mailing list
> bitcoin-dev@lists.linuxfoundation.org
> https://lists.linuxfoundation.org/mailman/listinfo/bitcoin-dev
>

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Re: [bitcoin-dev] [Lightning-dev] RBF Pinning with Counterparties and Competing Interest

[ZmnSCPxj]

Good morning Matt, and list,



>     RBF Pinning HTLC Transactions (aka "Oh, wait, I can steal funds, how, now?")
>     =============================
>
>     You'll note that in the discussion of RBF pinning we were pretty broad, and that that discussion seems to in fact cover
>     our HTLC outputs, at least when spent via (3) or (4). It does, and in fact this is a pretty severe issue in today's
>     lightning protocol [2]. A lightning counterparty (C, who received the HTLC from B, who received it from A) today could,
>     if B broadcasts the commitment transaction, spend an HTLC using the preimage with a low-fee, RBF-disabled transaction.
>     After a few blocks, A could claim the HTLC from B via the timeout mechanism, and then after a few days, C could get the
>     HTLC-claiming transaction mined via some out-of-band agreement with a small miner. This leaves B short the HTLC value.

My (cached) understanding is that, since RBF is signalled using `nSequence`, any `OP_CHECKSEQUENCEVERIFY` also automatically imposes the requirement "must be RBF-enabled", including `<0> OP_CHECKSEQUENCEVERIFY`.
Adding that clause (2 bytes in witness if my math is correct) to the hashlock branch may be sufficient to prevent C from making an RBF-disabled transaction.

But then you mention out-of-band agreements with miners, which basically means the transaction might not be in the mempool at all, in which case the vulnerability is not really about RBF or relay, but sheer economics.

The payment is A->B->C, and the HTLC A->B must have a larger timeout (L + 1) than the HTLC B->C (L), in abstract non-block units.
The vulnerability you are describing means that the current time must now be L + 1 or greater ("A could claim the HTLC from B via the timeout mechanism", meaning the A->B HTLC has timed out already).

If so, then the B->C transaction has already timed out in the past and can be claimed in two ways, either via B timeout branch or C hashlock branch.
This sets up a game where B and C bid to miners to get their version of reality committed onchain.
(We can neglect out-of-band agreements here; miners have the incentive to publicly leak such agreements so that other potential bidders can offer even higher fees for their versions of that transaction.)

Before L+1, C has no incentive to bid, since placing any bid at all will leak the preimage, which B can then turn around and use to spend from A, and A and C cannot steal from B.

Thus, B should ensure that *before* L+1, the HTLC-Timeout has been committed onchain, which outright prevents this bidding war from even starting.

The issue then is that B is using a pre-signed HTLC-timeout, which is needed since it is its commitment tx that was broadcast.
This prevents B from RBF-ing the HTLC-Timeout transaction.

So what is needed is to allow B to add fees to HTLC-Timeout:

* We can add an RBF carve-out output to HTLC-Timeout, at the cost of more blockspace.
* With `SIGHASH_NOINPUT` we can make the C-side signature `SIGHASH_NOINPUT|SIGHASH_SINGLE` and allow B to re-sign the B-side signature for a higher-fee version of HTLC-Timeout (assuming my cached understanding of `SIGHASH_NOINPUT` still holds).

With this, B can exponentially increase the fee as L+1 approaches.
If B can get HTLC-Timeout confirmed before L+1, then C cannot steal the HTLC value at all, since the UTXO it could steal from has already been spent.

In particular, it does not seem to me that it is necessary to change the hashlock-branch transaction of C at all, since this mechanism is enough to sidestep the issue (as I understand it).
But it does point to a need to make HTLC-Timeout (and possibly symmetrically, HTLC-Success) also fee-bumpable.

Note as well that this does not require a mempool: B can run in `blocksonly` mode and as each block comes in from L to L+1, if HTLC-Timeout is not confirmed, feebump HTLC-Timeout.
In particular, HTLC-Timeout comes into play only if B broadcast its own commitment transaction, and B *should* be aware that it did so --- there is still no need for mempool monitoring here.


Now, of course this only delays the war.
Let us now consider what C can do to ensure that the bidding war will happen eventually.

* C can bribe a miner to prevent HTLC-Timeout from confirming between L and L+1.
  * Or in other words, this is a censorship attack.
    * The Bitcoin censorship-resistance model is that censored transactions can be fee-bumped, which attracts non-censoring miners to try their luck at mining and evict the censoring miner.
      * Thus, letting B bump the fee on HTLC-Timeout is precisely the mechanism we need.
      * This sets up a bidding war between C requesting miners to censor, vs. B requesting miners to confirm, but that only sets the stage for a second bidding war later between C and B, thus C is at a disadvantage: it has to bribe miners to censor continuously from L to L+1 *and* additional bribe miners to confirm its transaction after L+1, whereas B can offer its bribe as being something that miners can claim now without waiting after L+1.



The issue of course is the additional output that bloats the UTXO set and requires another transaction to claim later.
And if we have `SIGHASH_NOINPUT`, it seems to me that Decker-Russell-Osuntokun sidesteps this issue as well, as any timed-out HTLC can be claimed with a fee-bumpable transaction directly without RBF-carve-out.
(As well, it seems to me that, if both nodes support doing so, a Poon-Dryja channel can be upgraded, without onchain activity, to a Decker-Russell-Osuntokun channel: sign a transaction spending the funding tx to a txo that has been set up as Decker-Russell-Osuntokun, do not broadcast that transaction, then revoke the latest Poon-Dryja commitment transactions, then switch the mechanism over to Decker-Russell-Osuntokun; you still need to monitor for previous Poon-Dryja commitment transactions, but HTLCs now sidestep the issue under discussion here.)

Regards,
ZmnSCPxj