Draft: draft-ietf-quic-transport

Commentary: I ’d prefer to always close the connection instead of silently discarding the frames . The problem with discarding frames is that while it does n’t really hurt with “ normal ” TLS 1.3 , there might be TLS extensions which require the reliable delivery of post - Handshake messages . Furthermore , acknowledging a packet means that a peer has processsed all the frames . Silently dropping frames seems like an awkward exception to that rule . 
 Good point . That seems like a good principle to apply here . 
 We discussed this in Tokyo ( ) , and there are basically 3 options here : Implement proper flow control for CRYPTO frames Specify a buffer size ( 50k is the example from the Tokyo discussion ) Drop CRYPTO frames if an endpoint has to buffer too many My sense of the room was that the 3rd option was the preferred option for now . When we have TLS extensions where we care about reliable delivery of post - handshake messages , that sounds like a good time to add proper flow control . I do n't like picking a fixed buffer size for the same reason as using timers for discarding keys . If we pick a buffer size now , how do we know that it will be big enough for whatever future TLS extensions might get used with QUIC ( or future key exchanges ) ? I do n't think that this breaks a rule of acknowledging packets means that the peer has processed all frames in that packet . For example , if an endpoint receives a packet containing stream data that is a retransmission of previously received data , that endpoint in effect is dropping that STREAM frame . Here , the CRYPTO frame is being processed ( and the endpoint is immediately choosing to do nothing based on it ) . 
 As said , this was discussed in Tokyo and I believe included in the recent consensus call on the list , so I 'd prefer to land this and gain some implementation experience , even if I might personally prefer a different solution . As states , there are 3 options , and the WG has repeatedly said no to flow control and a number of people did n't like a fixed limit on the entire connection , so we ended up with the 3rd option . 
 I do n't think this is a fair characterization . For the sender , it does n't really matter if it was this copy of the data , or an earlier STREAM frame containing exactly the same data . The ACK signals that the data was delivered to the application , and that 's all that matters . Exactly the opposite . Processing the CRYPTO frame would mean to deliver it to the TLS stack . Here it 's dropped one layer below that . Everywhere else in the spec , we use " processing " in the sense that the data has been acted upon , not in the sense that the frame was merely parsed . 
 Is this buffering covering the internal TLS state engine , or is that separate ? 
 This is buffering in the QUIC layer ( specifically buffering out of order data that ca n't be delivered to the TLS stack ) - the TLS stack probably has its own internal buffers , but that 's opaque to QUIC . 
 As says , the TLS stack will be expecting data to be delivered in order . If it ca n't keep up , or data arrives waaay out of order , that is when the transport needs to decide what to do . ( That is why this text belongs in the transport doc and not the TLS one , in case people were wondering . ) 
 Is there anything else I need to do to get this PR merged ? 
 Consider the following situation . The client sends a 0 - RTT handshake . The server accepts the handshake , installs the 1 - RTT keys and sends its ServerHello ... Finished flight . The client can now send a bunch of post - handshake messages to the server which the server can not process until it receives ClientFinished , so it has to buffer them . We should bound that buffer somehow . 
 (  post - handshake messages do n't really exist today , but they might in the future , e.g. , with ) Another incarnation of this problem is if the client receives a huge window of CRYPTO frames into the future but not the first byte , so it ca n't process anything yet . With STREAM frames , we have flow control . With CRYPTO frames during the handshake , we know the handshake itself is bounded . Post - handshake , we do n't know a priori the server wo n't send lots and lots of tickets . Of course , realistically , it wo n't send that many in a row , so one could get away with just picking a bound . But this is much more of an ad - hoc bound than the handshake . It also may send lots of tickets over the course of a connection , so the bound is in how far ahead it can get , rather than the handshake which can impose a stronger total bound . This then starts looking an awful lot like flow control ... 
 Is n't the expected behavior of the server to drop the 1 - RTT packets containing the post - handshake messages until it receives the ClientFinished ( that activates the 1 - RTT read key ) ? To put it another way , my understanding is that you can have any size of buffer you want to better cope with packet reordering , but that happens per - packet rather than per - frame ( because it 's not just the post - handshake messages that can not be trusted prior to receiving ClientFinished ) , and that the buffer can be arbitrary sized because you can drop it to trigger a retransmit . Am I missing something ? 
 I agree that the problem exists . However , in my view , the memory exhaustion issue does not get resolved just by having a window for the CRYTO frames . My understanding that most TLS stacks buffers the octets of a handshake message until it receives a complete one . That means that the TLS stack is expected to buffer at most 16 MB of junk even if we introduce window to the CRYPTO frames . Considering that , I think it would be preferable to at first discuss introducing bounds for the TLS messages in the TLS working group , then consider how to apply that to QUIC . Until then , each QUIC stack or TLS stack can ( continue to ) have its own internal limit . 
 I do n't think that 's an accurate reduction . TLS stacks usually impose ad - hoc limits tighter than the maximum 2 ^ 24 , sometimes as a function of the maximum certificate size the caller configures . It 's unfortunate that it 's ad - hoc but different consumers do indeed tolerate different certificate sizes . It 's plausible to do that analysis per - message and to do it per - flight since the set of messages in a flight is one of a few fixed patterns . Post - handshake is very different . The pattern of messages is no longer fixed . Rather it is a property of how the application uses TLS . Indeed the QUIC spec even calls out applications choosing to send tickets at various points during the connection . Thus TLS - level limits , ad - hoc or spec'd , are not sufficient in this case . QUIC needs to do its share of the work . ( There 's a reason I dislike post - handshake messages so much . :-) People always forget this complexity . ) 
 Re the client Finished case , I guess that pulls in the mess of stuff around there . The spec is a little unclear what a server does in between server and client Finished . In particular , if doing 0 - RTT the server needs to at least be willing to send half - RTT data . This text suggests that , since there 's a binder , processing out of order is okay . ( Unless I 'm reading it wrong ? ) I agree that , if you believe the server just should n't process 1RTT packets before client Finished at all , the buffering issue is solved . Though it does leave it unable to read the ACKs to half - RTT data which is differently weird . :-) I think the general post - handshake issue is probably the more isolated instance . They 're the same problem in terms of buffering , but one has a confounding factor around whether it 's actually an issue . 
 Oh I missed it . Thank you for pointing that out . I had assumed that TLS stacks always expose the 1 - RTT read key to the QUIC stacks acting as a server when it receives ClientFinished . I 'd be curious to know if there are TLS stacks that takes an alternative approach . I assume that issue is unrelated to 0 - RTT , right ? IIUC the advise to the QUIC stacks is that until you know that the peer can process a packet , you might want to coalesce the packet you send with another packet that uses a lower - epoch key ; then you can have a weak confirmation that the packet has reached the peer . Having such signal is beneficial to not give false information to the congestion controller though the loss recovery code needs to assume that the packet might have been lost , because a stack is allowed to drop a packet that is was unable to decrypt . I agree . I think it is preferable to fix the issue . Maybe I should rephrase my argument to that there should be limits in both layers ( i.e. limit on the post - handshake message size in the TLS layer , and the window size in the QUIC layer ) , because having limit only on one layer does not prevent excessive buffering on the other layer . The two limits could either be a shared single value , two values shared using one extension , or two values shared using different mechanisms . 
 I 'm very much inclined to leave this " unfixed " , but to leave a warning that sending large post - handshake messages risks connection failure . That was what I had assumed too , until I thought through the nasty interactions with partial Handshake flights and 0 - RTT . That is , the TLS stack makes secrets available at the point that it would normally be installing them for its own use . In that way , a server would n't install the 1 - RTT read keys until it had processed the finished from the client , exactly as you say . My current patch ( which is still under review ) releases secrets as soon as possible to avoid the problem where the server ca n't read Handshake acknowledgements because it is receiving 0 - RTT . The main consequence of that is that you need a separate API where the TLS stack tells the QUIC stack what it is willing to send and receive ( well , I had a ton of fun fixing tests as well , but that 's just because we were a little lazy with certain things in the past ) . 
 Right , this issue originally came up as we were thinking through key availability vs key install times . The problem is , as you note , it 's weird to allow sending data you can not read ACKs for . ( Conversely , it 's weird , perhaps fatally so , to allow receiving data you can not send ACKs for . ) Though it 's not the only scenario . The other side may send a burst of tickets . The point is that 's not a sufficient warning . This is either a problem or a nitpick depending on the solution . Sending an overly large message , in general , risks connection failure . TLS stacks bound the size there based on some ad - hoc analysis that no sane NewSessionTicket ( or other message ) will ever exceed such - and - such bytes based on what goes in it . TLS stacks typically buffer up a message before processing , so it makes sense that the TLS stack is responsible for buffering it . But that 's distinct from sending many post - handshake messages . TLS over QUIC must also account for that due to the lack of flow control . TLS over TCP does not have this problem because TCP provides flow control . If I try to send a million 100 - byte TLS messages over TCP , I 'll quickly run into TCP 's flow control . QUIC , however , does n't have such flow control for CRYPTO frames . Instead it relies on a limit from the crypto protocol : Although the TLS stack natively bounds a single message rather than total data , it is easy to compute a total limit during the handshake because there are only a fixed handful of messages . Thus the advice there works .... except for post - handshake messages . Thus the issue . Realistically , it 's probably fine to handwaive and say : The bound is not total data ever sent at the encryption level , but amount of data ahead of the read position . Pick some ad - hoc limit for post - handshake stuff , enough to fit a bunch of NSTs . Yeah , do n't send too many NSTs in a row . You can send a bunch of them over the lifetime of the connection , but space them out a bit so you 're sure the receiver is n't waiting on the first byte , having buffered the rest up . Probably you wo n't end up in a situation where the first NST packet keeps getting lost and as you queue up more and more NSTs over the lifetime of the connection . That would be strange . But it also smells weird , so perhaps proper flow control ( toss post - hs stuff onto stream 0 ? ) would be better instead ? 
 I had assumed that TLS stacks always expose the 1 - RTT read key to the QUIC stacks acting as a server when it receives ClientFinished . I 'd be curious to know if there are TLS stacks that takes an alternative approach . Thank you for pointing that out . I forgot about that exception . So while that is the only exception picotls has in terms of key installation timing , I agree that it 's merely about having one exception or two ... I am totally fine with handwaving , but in case we are to have flow control , I 'd prefer having flow control for CRYPTO streams in all epochs . They could all use a fixed - size window that would be defined in the specification . I prefer that because IMO having flow control for every stream ( i.e. all the ordinary streams + all the 4 CRYPTO streams ) is a simplification . 
 FWIW we had a similar discussion about stream 0 flow control in and during the stream 0 design team discussions . 
 The problem here is that CRYPTO is not flow controlled . Endpoints can cause arbitrary buffering of CRYPTO frame data . This has very little to do with the handshake ( though notes that we have a similar concern for CRYPTO in Initial and Handshake , that is bounded by the handshake timers ) . Proposal is to allow endpoints to maintain a buffer of any size they choose . If they receive a TLS message that does not fit into that buffer , they can drop all subsequent TLS data . The effect of this is to disable TLS from that point onward . Currently , we do n't depend on this frame for anything other that NewSessionTicket , for which loss has no real consequence . We will assign a minimum buffer size that implementations are required to support , probably something small like 4k . A higher limit is possible . If an endpoint finds that this buffer is overrun they MAY discard all CRYPTO frames with higher offsets , or they MAY drop the connection with a code . 
 In Tokyo : 
 Please do n't close issues until AFTER consensus is declared ( not just called ) . 
 Minor nits . I think that this is good . Thanks for doing the hard work  . I believe that this issue can be resolved without chair involvement as it is a conclusion from the Tokyo meeting . I think this is definitely in a gray area . Generally , I view the action of sending an ACK for a packet as saying " I 've received the data you sent me , and I do n't need that data any more . Do n't retransmit it . " It 's really up to the receiver to decide what that means . The sender can then always safely assume the data does n't need to be retransmitted . It ca n't know when ( or if ) the data ever gets delivered to the next layer ; whether that 's the application sitting on top of a stream or TLS on top of the crypto stream . Only by receiving data from that next layer in response can the original sender know for sure .
Paragraph (version B):
Implementations need to maintain a buffer of CRYPTO data received out
of order.  Because there is no flow control of CRYPTO frames, an
endpoint could potentially force its peer to buffer an unbounded
amount of data.
Paragraph (version B):
Being unable to buffer CRYPTO frames during the handshake can lead to
a connection failure.  If an endpoint's buffer is exceeded during the
handshake, it can expand its buffer temporarily to complete the
handshake.  If an endpoint does not expand its buffer, it MUST close
the connection with a CRYPTO_BUFFER_EXCEEDED error code.
Paragraph (version B):
An endpoint has received more data in CRYPTO frames than it can
buffer.