Re: [HACKERS] Group commit, revised
On 04.02.2012 07:24, Jeff Janes wrote: Is it safe to assume that, under #ifdef LWLOCK_STATS, a call to LWLockAcquire will always precede any calls to LWLockWaitUntilFree when a new process is started, to calloc the stats assays? I guess it is right now, because the only user is WALWrite, which would never be acquired before WALInsert is at least once. But this doesn't seem very future proof. Agreed, we can't count on that. There's no clear single point after a process startup where the first lwlock is acquired. Out of curiosity, I added an elog(LOG, ...) to that initialization code, to log which lwlock is acquired first in a process. It depends on the process and circumstances - here's the list I got: BufFreeListLock ShmemIndexLock XidGenLock ProcArrayLock BgWriterCommLock AutoVacuumLock And that's probably not all, I bet you would acquire different locks first with recovery, streaming replication etc.. I didn't test those. Anyway, I added the initialization to LWLockWaitUntilFree now. Thanks! I guess the same complain could be logged against LWLockConditionalAcquire. LWLockConditionalAcquire doesn't update the stats, so it's ok. -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Mon, Jan 30, 2012 at 6:57 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: On 27.01.2012 15:38, Robert Haas wrote: On Fri, Jan 27, 2012 at 8:35 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: Yeah, we have to be careful with any overhead in there, it can be a hot spot. I wouldn't expect any measurable difference from the above, though. Could I ask you to rerun the pgbench tests you did recently with this patch? Or can you think of a better test for this? I can't do so immediately, because I'm waiting for Nate Boley to tell me I can go ahead and start testing on that machine again. But I will do it once I get the word. I committed this. I ran pgbench test on an 8-core box and didn't see any slowdown. It would still be good if you get a chance to rerun the bigger test, but I feel confident that there's no measurable slowdown. Is it safe to assume that, under #ifdef LWLOCK_STATS, a call to LWLockAcquire will always precede any calls to LWLockWaitUntilFree when a new process is started, to calloc the stats assays? I guess it is right now, because the only user is WALWrite, which would never be acquired before WALInsert is at least once. But this doesn't seem very future proof. I guess the same complain could be logged against LWLockConditionalAcquire. Since people wouldn't be expected to define LWLOCK_STATS on production builds, perhaps this issue is ignorable. Cheers, Jeff -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Tue, Jan 31, 2012 at 7:43 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: That seems like a pretty marginal gain. If you're bound by the speed of fsyncs, this will reduce the latency by the time it takes to mark the clog, which is tiny in comparison to all the other stuff that needs to happen, like, flushing the WAL. And that's ignoring any additional overhead caused by the signaling between processes. If you're bound by CPU capacity, this doesn't help at all because it just moves the work around. We're not bound by CPU capacity. Latency is an issue, especially when contention drives it higher with occasional spikes. I expect this to have a good measurable impact, as well as a stabilising effect on the latency. Anyway, this is quite different from the original goal and patch for group commit, so can we please leave this for 9.3, and move on with the review of pending 9.2 patches. Actually, there is very little change here from the original patch. But I would note that your own changes were also quite different, and had no noticeable gain. They were also based on a brand new and radical set of thoughts. -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Tue, Jan 31, 2012 at 3:02 AM, Simon Riggs si...@2ndquadrant.com wrote: On Tue, Jan 31, 2012 at 7:43 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: That seems like a pretty marginal gain. If you're bound by the speed of fsyncs, this will reduce the latency by the time it takes to mark the clog, which is tiny in comparison to all the other stuff that needs to happen, like, flushing the WAL. And that's ignoring any additional overhead caused by the signaling between processes. If you're bound by CPU capacity, this doesn't help at all because it just moves the work around. We're not bound by CPU capacity. Latency is an issue, especially when contention drives it higher with occasional spikes. I expect this to have a good measurable impact, as well as a stabilising effect on the latency. Anyway, this is quite different from the original goal and patch for group commit, so can we please leave this for 9.3, and move on with the review of pending 9.2 patches. Actually, there is very little change here from the original patch. But I would note that your own changes were also quite different, and had no noticeable gain. They were also based on a brand new and radical set of thoughts. I think you're trying to muddy the waters. Heikki's implementation was different than yours, and there are some things about it I'm not 100% thrilled with, but it's fundamentally the same concept. The new idea you're describing here is something else entirely. Instead of focusing on a technical critique of one implementation vs. another (out of the three we have to choose from), you're looking at cramming more optimizations into the implementation you prefer. I'm pretty sure that Heikki's implementation could support that optimization, too, if we actually want to do it that way. But there might be good reasons not to do it that way: for example, every transaction commit will have to bump the CLOG page LSN, which will delay setting hint bits on other transactions on the page in cases where they can now be set immediately. In any event, trying to slip it into the group commit patch will serve only to prevent it from getting the separate scrutiny which it doubtless deserves. -- Robert Haas EnterpriseDB: http://www.enterprisedb.com The Enterprise PostgreSQL Company -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 31 January 2012 14:24, Robert Haas robertmh...@gmail.com wrote: I think you're trying to muddy the waters. Heikki's implementation was different than yours, and there are some things about it I'm not 100% thrilled with, but it's fundamentally the same concept. The new idea you're describing here is something else entirely. Instead of focusing on a technical critique of one implementation vs. another (out of the three we have to choose from), you're looking at cramming more optimizations into the implementation you prefer. I'm pretty sure that Heikki's implementation could support that optimization, too, if we actually want to do it that way. But there might be good reasons not to do it that way: for example, every transaction commit will have to bump the CLOG page LSN, which will delay setting hint bits on other transactions on the page in cases where they can now be set immediately. In any event, trying to slip it into the group commit patch will serve only to prevent it from getting the separate scrutiny which it doubtless deserves. Well, I also think it deserves separate scrutiny, but it's not as if it can be reasonably argued that it can be isolated from 1 of those 3 implementations. Our immediate goal is to produce a benchmark of a new patch, that operates on the same fundamental principle as the original patch, though with a much reduced code footprint. We then have a reasonable basis for comparison: The original benchmark (or possibly a new benchmark on the original patch, which has seemingly identical performance characteristics to Heikki's anyway), and the new patch. -- Peter Geoghegan http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training and Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 27.01.2012 15:38, Robert Haas wrote: On Fri, Jan 27, 2012 at 8:35 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: Yeah, we have to be careful with any overhead in there, it can be a hot spot. I wouldn't expect any measurable difference from the above, though. Could I ask you to rerun the pgbench tests you did recently with this patch? Or can you think of a better test for this? I can't do so immediately, because I'm waiting for Nate Boley to tell me I can go ahead and start testing on that machine again. But I will do it once I get the word. I committed this. I ran pgbench test on an 8-core box and didn't see any slowdown. It would still be good if you get a chance to rerun the bigger test, but I feel confident that there's no measurable slowdown. -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Mon, Jan 30, 2012 at 2:57 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I committed this. I ran pgbench test on an 8-core box and didn't see any slowdown. It would still be good if you get a chance to rerun the bigger test, but I feel confident that there's no measurable slowdown. I asked clearly and specifically for you to hold back committing anything. Not sure why you would ignore that and commit without actually asking myself or Peter. On a point of principle alone, I think you should revert. Working together is difficult if communication channels are openly ignored and disregarded. Peter and I have been working on a new version that seems likely to improve performance over your suggestions. We should be showing something soon. -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 30.01.2012 17:18, Simon Riggs wrote: On Mon, Jan 30, 2012 at 2:57 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I committed this. I ran pgbench test on an 8-core box and didn't see any slowdown. It would still be good if you get a chance to rerun the bigger test, but I feel confident that there's no measurable slowdown. I asked clearly and specifically for you to hold back committing anything. Not sure why you would ignore that and commit without actually asking myself or Peter. On a point of principle alone, I think you should revert. Working together is difficult if communication channels are openly ignored and disregarded. You must be referring to this: http://archives.postgresql.org/pgsql-hackers/2012-01/msg01406.php What I committed in the end was quite different from the version that was in reply to, too. If you have a specific objection to the patch as committed, please let me know. Peter and I have been working on a new version that seems likely to improve performance over your suggestions. We should be showing something soon. Please post those ideas, and let's discuss them. If it's something simple, maybe we can still sneak them into this release. Otherwise, let's focus on the existing patches that are pending review or commit. -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Sun, Jan 29, 2012 at 1:20 PM, Greg Smith g...@2ndquadrant.com wrote: On 01/28/2012 07:48 PM, Jeff Janes wrote: I haven't inspected that deep fall off at 30 clients for the patch. By way of reference, if I turn off synchronous commit, I get tps=1245.8 which is 100% CPU limited. This sets an theoretical upper bound on what could be achieved by the best possible group committing method. This sort of thing is why I suspect that to completely isolate some results, we're going to need a moderately high end server--with lots of cores--combined with an intentionally mismatched slow drive. It's too easy to get pgbench and/or PostgreSQL to choke on something other than I/O when using smaller core counts. I don't think I have anything where the floor is 24 TPS per client though. Hmmm...I think I can connect an IDE drive to my MythTV box and format it with ext4. Thanks for the test idea. One thing you could try on this system is using the -N Do not update pgbench_tellers and pgbench_branches. That eliminates a lot of the contention that might be pulling down your higher core count tests, while still giving a completely valid test of whether the group commit mechanism works. Not sure whether that will push up the top-end usefully for you, worth a try if you have time to test again. Adding the -N did eliminate the fall-off at 30 clients for group_commit patch. But, I still want to explore why the fall off occurs when I get a chance. I know why the curve would stop going up without using -N (with -s of 40 and -c of 30, many connections will be waiting on row locks for updates to pgbench_branches) but that should cause a leveling off, not a collapse. Other than the lack of drop off at 30 clients, -N didn't meaningfully change anything. Everyone got slightly faster except at -c1. If the group_commit patch goes in, would we then rip out commit_delay and commit_siblings? The main reason those are still hanging around at all are to allow pushing on the latency vs. throughput trade-off on really busy systems. The use case is that you expect, say, 10 clients to constantly be committing at a high rate. So if there's just one committing so far, assume it's the leading edge of a wave and pause a bit for the rest to come in. I don't think the cases where this is useful behavior--people both want it and the current mechanism provides it--are very common in the real world. The tests I did are exactly that environment where commit_delay might be expected to help. And it did help, but just not all that much. One of the problems is that while it does wait for those others to come in and then it does flush them in one fsync; but often the others never get woken up successfully to realize that they have already been flushed. They continue to block. The group_commit patch, on the other hand, accomplishes exactly what commit_delay was intended to accomplish but doesn't do a very good job of. With the -N option, I also used commit_delay on top of group_commit, and the difference between the two look like it was within the margin of error. So commit_delay did not obviously cause further improvement. It can be useful for throughput oriented benchmarks though, which is why I'd say it hasn't killed off yet. We'll have to see whether the final form this makes sense in will usefully replace that sort of thing. I'd certainly be in favor of nuking commit_delay and commit_siblings with a better option; it would be nice if we don't eliminate this tuning option in the process though. But I'm pretty sure that group_commit has stolen that thunder. Obviously a few benchmarks on one system isn't enough to prove that, though. The only use case I see left for commit_delay is where it is set on a per-connection basis rather than system-wide. Once you start a fsync, everyone who missed the bus is locked out until the next one. So low-priority connections can set commit_delay so as not to trigger the bus to leave before the high priority process gets on. But that seems like a pretty tenuous use case with better ways to do it. Cheers, Jeff -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Mon, Jan 30, 2012 at 3:32 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: On 30.01.2012 17:18, Simon Riggs wrote: I asked clearly and specifically for you to hold back committing anything. Not sure why you would ignore that and commit without actually asking myself or Peter. On a point of principle alone, I think you should revert. Working together is difficult if communication channels are openly ignored and disregarded. You must be referring to this: http://archives.postgresql.org/pgsql-hackers/2012-01/msg01406.php What I committed in the end was quite different from the version that was in reply to, too. If you have a specific objection to the patch as committed, please let me know. I said There is much yet to discuss so please don't think about committing anything yet. There's not really any way you could misinterpret them. Peter and I have been working on a new version that seems likely to improve performance over your suggestions. We should be showing something soon. Please post those ideas, and let's discuss them. If it's something simple, maybe we can still sneak them into this release. Otherwise, let's focus on the existing patches that are pending review or commit. If you really did want to discuss it, it would have taken you 5 minutes to check whether there was consensus on the patch before committing it. Your actions betray the opposite of a willingness to discuss anything. Yes, I'd like to discuss ideas, not just ram home a half-discussed and half-finished patch that happens to do things the way you personally prefer, overriding all inputs. Especially when you know we're working on another version. -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 30.01.2012 21:55, Simon Riggs wrote: On Mon, Jan 30, 2012 at 3:32 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: On 30.01.2012 17:18, Simon Riggs wrote: Peter and I have been working on a new version that seems likely to improve performance over your suggestions. We should be showing something soon. Please post those ideas, and let's discuss them. If it's something simple, maybe we can still sneak them into this release. Otherwise, let's focus on the existing patches that are pending review or commit. If you really did want to discuss it, it would have taken you 5 minutes to check whether there was consensus on the patch before committing it. Your actions betray the opposite of a willingness to discuss anything. Yes, I'd like to discuss ideas, not just ram home a half-discussed and half-finished patch that happens to do things the way you personally prefer, overriding all inputs. Especially when you know we're working on another version. Sorry. So, what's the approach you're working on? -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Mon, Jan 30, 2012 at 8:04 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: So, what's the approach you're working on? I've had a few days leave at end of last week, so no time to fully discuss the next steps with the patch. That's why you were requested not to commit anything. You've suggested there was no reason to have the WALwriter be involved, which isn't the case and made other comments about latches that weren't correct also. The plan here is to allow WAL flush and clog updates to occur concurrently. Which allows the clog contention and update time to be completely hidden behind the wait for the WAL flush. That is only possible if we have the WALwriter involved since we need two processes to be actively involved. It's a relatively minor change and uses code that is already committed and working, not some just invented low level stuff that might not work right. You might then ask, why the delay? Just simply because my absence has prevented moving forwards. We'll have a patch tomorrow. The theory behind this is clear, but needs some explanation. There are 5 actions that need to occur at commit 1) insert WAL record 2) optionally flush WAL record 3) mark the clog AND set LSN from (1) if we skipped (2) 4) optionally wait for sync rep 5) remove the proc from the procarray Dependencies between those actions are these Step (3) must always happen before (5) otherwise we get race conditions in visibility checking. Step (4) must always happen before (5) otherwise we also get race conditions in disaster cases. Step (1) must always happen before (2) if it happens Step (1) must always happen before (3) if we skipped (2) Notice that step (2) and step (3) are actually independent of each other. So an improved design for commit is to 2) request flush up to LSN, but don't wait 3) mark the clog and set LSN 4) wait for LSN once, either for walwriter or walsender to release us This is free of race conditions as long as step (3) marks each clog page with a valid LSN, just as we would do for asynchronous commit. Marking the clog with an LSN ensures that we issue XLogFlush(LSN) on the clog page before it is written, so we always get WAL flushed to the desired LSN before the clog mark appears on disk. Does this cause any other behaviour? No, because the LSN marked on the clog is always flushed by the time we hit step (5), so there is no delay in any hint bit setting, or any other effect. So step (2) requests the flush, which is then performed by WALwriter. Backend then performs (3) while the flush takes place and then waits at step (4) to be woken We only wait once in step 4, rather than waiting for flush at step (2) and then waiting again at step (4). So we use the existing code path for TransactionIdAsyncCommitTree() yet we wait at step (4) using the SyncRep code. Step 5 happens last, as always. There are two benefits to this approach * The clog update happens for free since it is hidden behind a longer running task * The implementation uses already tested and robust code for SyncRep and AsyncCommit -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 31.01.2012 01:35, Simon Riggs wrote: The plan here is to allow WAL flush and clog updates to occur concurrently. Which allows the clog contention and update time to be completely hidden behind the wait for the WAL flush. That is only possible if we have the WALwriter involved since we need two processes to be actively involved. ... The theory behind this is clear, but needs some explanation. There are 5 actions that need to occur at commit 1) insert WAL record 2) optionally flush WAL record 3) mark the clog AND set LSN from (1) if we skipped (2) 4) optionally wait for sync rep 5) remove the proc from the procarray ... Notice that step (2) and step (3) are actually independent of each other. So an improved design for commit is to 2) request flush up to LSN, but don't wait 3) mark the clog and set LSN 4) wait for LSN once, either for walwriter or walsender to release us That seems like a pretty marginal gain. If you're bound by the speed of fsyncs, this will reduce the latency by the time it takes to mark the clog, which is tiny in comparison to all the other stuff that needs to happen, like, flushing the WAL. And that's ignoring any additional overhead caused by the signaling between processes. If you're bound by CPU capacity, this doesn't help at all because it just moves the work around. Anyway, this is quite different from the original goal and patch for group commit, so can we please leave this for 9.3, and move on with the review of pending 9.2 patches. -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 2012-01-29 01:48, Jeff Janes wrote: I ran three modes, head, head with commit_delay, and the group_commit patch shared_buffers = 600MB wal_sync_method=fsync optionally with: commit_delay=5 commit_siblings=1 pgbench -i -s40 for clients in 1 5 10 15 20 25 30 pgbench -T 30 -M prepared -c $clients -j $clients ran 5 times each, taking maximum tps from the repeat runs. The results are impressive. clients headhead_commit_delay group_commit 1 23.923.023.9 5 31.051.359.9 10 35.056.595.7 15 35.664.9136.4 20 34.368.7159.3 25 36.564.1168.8 30 37.283.871.5 I haven't inspected that deep fall off at 30 clients for the patch. By way of reference, if I turn off synchronous commit, I get tps=1245.8 which is 100% CPU limited. This sets an theoretical upper bound on what could be achieved by the best possible group committing method. If the group_commit patch goes in, would we then rip out commit_delay and commit_siblings? Adding to the list of tests that isn't excactly a real-world system I decided to repeat Jeff's tests on a Intel(R) Core(TM)2 Duo CPU E7500 @ 2.93GHz with 4GB of memory and an Intel X25-M 160GB SSD drive underneath. BaselineCommitdelay Group commit 1 1168.67 1233.33 1212.67 5 2611.33 3022.00 2647.67 10 3044.67 .33 3296.33 15 3153.33 3177.00 3456.67 20 3087.33 3126.33 3618.67 25 2715.00 2359.00 3309.33 30 2736.33 2831.67 2737.67 Numbers are average over 3 runs. I have set checkpoint_segments to 30 .. otherwise same configuration as Jeff. Attached is a graph. Nice conclusion is.. group commit outperforms baseline in all runs (on this system). My purpose was actual more to try to quantify the difference between a single SSD and a single rotating disk. -- Jesper attachment: pgbench.png -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 01/28/2012 07:48 PM, Jeff Janes wrote: Others are going to test this out on high-end systems. I wanted to try it out on the other end of the scale. I've used a Pentium 4, 3.2GHz, with 2GB of RAM and with a single IDE drive running ext4. ext4 is amazingly bad on IDE, giving about 25 fsync's per second (and it lies about fdatasync, but apparently not about fsync) Fantastic, I had to stop for a minute to check the date on your message for a second there, make sure it hadn't come from some mail server that's been backed up on delivery the last five years. I'm cleaning house toward testing this out here, and I was going to test on the same system using both fast and horribly slow drives. Both ends of the scale are important, and they benefit in a very different way from these changes. I haven't inspected that deep fall off at 30 clients for the patch. By way of reference, if I turn off synchronous commit, I get tps=1245.8 which is 100% CPU limited. This sets an theoretical upper bound on what could be achieved by the best possible group committing method. This sort of thing is why I suspect that to completely isolate some results, we're going to need a moderately high end server--with lots of cores--combined with an intentionally mismatched slow drive. It's too easy to get pgbench and/or PostgreSQL to choke on something other than I/O when using smaller core counts. I don't think I have anything where the floor is 24 TPS per client though. Hmmm...I think I can connect an IDE drive to my MythTV box and format it with ext4. Thanks for the test idea. One thing you could try on this system is using the -N Do not update pgbench_tellers and pgbench_branches. That eliminates a lot of the contention that might be pulling down your higher core count tests, while still giving a completely valid test of whether the group commit mechanism works. Not sure whether that will push up the top-end usefully for you, worth a try if you have time to test again. If the group_commit patch goes in, would we then rip out commit_delay and commit_siblings? The main reason those are still hanging around at all are to allow pushing on the latency vs. throughput trade-off on really busy systems. The use case is that you expect, say, 10 clients to constantly be committing at a high rate. So if there's just one committing so far, assume it's the leading edge of a wave and pause a bit for the rest to come in. I don't think the cases where this is useful behavior--people both want it and the current mechanism provides it--are very common in the real world. It can be useful for throughput oriented benchmarks though, which is why I'd say it hasn't killed off yet. We'll have to see whether the final form this makes sense in will usefully replace that sort of thing. I'd certainly be in favor of nuking commit_delay and commit_siblings with a better option; it would be nice if we don't eliminate this tuning option in the process though. -- Greg Smith 2ndQuadrant USg...@2ndquadrant.com Baltimore, MD PostgreSQL Training, Services, and 24x7 Support www.2ndQuadrant.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Fri, Jan 27, 2012 at 5:35 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: On 26.01.2012 04:10, Robert Haas wrote: I think you should break this off into a new function, LWLockWaitUntilFree(), rather than treating it as a new LWLockMode. Also, instead of adding lwWaitOnly, I would suggest that we generalize lwWaiting and lwExclusive into a field lwWaitRequest, which can be set to 1 for exclusive, 2 for shared, 3 for wait-for-free, etc. That way we don't have to add another boolean every time someone invents a new type of wait - not that that should hopefully happen very often. A side benefit of this is that you can simplify the test in LWLockRelease(): keep releasing waiters until you come to an exclusive waiter, then stop. This possibly saves one shared memory fetch and subsequent test instruction, which might not be trivial - all of this code is extremely hot. Makes sense. Attached is a new version, doing exactly that. Others are going to test this out on high-end systems. I wanted to try it out on the other end of the scale. I've used a Pentium 4, 3.2GHz, with 2GB of RAM and with a single IDE drive running ext4. ext4 is amazingly bad on IDE, giving about 25 fsync's per second (and it lies about fdatasync, but apparently not about fsync) I ran three modes, head, head with commit_delay, and the group_commit patch shared_buffers = 600MB wal_sync_method=fsync optionally with: commit_delay=5 commit_siblings=1 pgbench -i -s40 for clients in 1 5 10 15 20 25 30 pgbench -T 30 -M prepared -c $clients -j $clients ran 5 times each, taking maximum tps from the repeat runs. The results are impressive. clients headhead_commit_delay group_commit 1 23.923.023.9 5 31.051.359.9 10 35.056.595.7 15 35.664.9136.4 20 34.368.7159.3 25 36.564.1168.8 30 37.283.871.5 I haven't inspected that deep fall off at 30 clients for the patch. By way of reference, if I turn off synchronous commit, I get tps=1245.8 which is 100% CPU limited. This sets an theoretical upper bound on what could be achieved by the best possible group committing method. If the group_commit patch goes in, would we then rip out commit_delay and commit_siblings? Cheers, Jeff attachment: graph.png -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 26.01.2012 04:10, Robert Haas wrote:
On Wed, Jan 25, 2012 at 3:11 AM, Heikki Linnakangas
heikki.linnakan...@enterprisedb.com wrote:
Attached is a patch to do that. It adds a new mode to
LWLockConditionalAcquire(), LW_EXCLUSIVE_BUT_WAIT. If the lock is free, it
is acquired and the function returns immediately. However, unlike normal
LWLockConditionalAcquire(), if the lock is not free it goes to sleep until
it is released. But unlike normal LWLockAcquire(), when the lock is
released, the function returns *without* acquiring the lock.
...
I think you should break this off into a new function,
LWLockWaitUntilFree(), rather than treating it as a new LWLockMode.
Also, instead of adding lwWaitOnly, I would suggest that we generalize
lwWaiting and lwExclusive into a field lwWaitRequest, which can be set
to 1 for exclusive, 2 for shared, 3 for wait-for-free, etc. That way
we don't have to add another boolean every time someone invents a new
type of wait - not that that should hopefully happen very often. A
side benefit of this is that you can simplify the test in
LWLockRelease(): keep releasing waiters until you come to an exclusive
waiter, then stop. This possibly saves one shared memory fetch and
subsequent test instruction, which might not be trivial - all of this
code is extremely hot.
Makes sense. Attached is a new version, doing exactly that.
We probably want to benchmark this carefully
to make sure that it doesn't cause a performance regression even just
from this:
+ if (!proc-lwWaitOnly)
+ lock-releaseOK = false;
I know it sounds crazy, but I'm not 100% sure that that additional
test there is cheap enough not to matter. Assuming it is, though, I
kind of like the concept: I think there must be other places where
these semantics are useful.
Yeah, we have to be careful with any overhead in there, it can be a hot
spot. I wouldn't expect any measurable difference from the above,
though. Could I ask you to rerun the pgbench tests you did recently with
this patch? Or can you think of a better test for this?
--
Heikki Linnakangas
EnterpriseDB http://www.enterprisedb.com
*** a/src/backend/access/transam/twophase.c
--- b/src/backend/access/transam/twophase.c
***
*** 327,333 MarkAsPreparing(TransactionId xid, const char *gid,
proc-databaseId = databaseid;
proc-roleId = owner;
proc-lwWaiting = false;
! proc-lwExclusive = false;
proc-lwWaitLink = NULL;
proc-waitLock = NULL;
proc-waitProcLock = NULL;
--- 327,333
proc-databaseId = databaseid;
proc-roleId = owner;
proc-lwWaiting = false;
! proc-lwWaitMode = 0;
proc-lwWaitLink = NULL;
proc-waitLock = NULL;
proc-waitProcLock = NULL;
*** a/src/backend/access/transam/xlog.c
--- b/src/backend/access/transam/xlog.c
***
*** 2118,2140 XLogFlush(XLogRecPtr record)
/* initialize to given target; may increase below */
WriteRqstPtr = record;
! /* read LogwrtResult and update local state */
{
/* use volatile pointer to prevent code rearrangement */
volatile XLogCtlData *xlogctl = XLogCtl;
SpinLockAcquire(xlogctl-info_lck);
if (XLByteLT(WriteRqstPtr, xlogctl-LogwrtRqst.Write))
WriteRqstPtr = xlogctl-LogwrtRqst.Write;
LogwrtResult = xlogctl-LogwrtResult;
SpinLockRelease(xlogctl-info_lck);
- }
! /* done already? */
! if (!XLByteLE(record, LogwrtResult.Flush))
! {
! /* now wait for the write lock */
! LWLockAcquire(WALWriteLock, LW_EXCLUSIVE);
LogwrtResult = XLogCtl-Write.LogwrtResult;
if (!XLByteLE(record, LogwrtResult.Flush))
{
--- 2118,2160
/* initialize to given target; may increase below */
WriteRqstPtr = record;
! /*
! * Now wait until we get the write lock, or someone else does the
! * flush for us.
! */
! for (;;)
{
/* use volatile pointer to prevent code rearrangement */
volatile XLogCtlData *xlogctl = XLogCtl;
+ /* read LogwrtResult and update local state */
SpinLockAcquire(xlogctl-info_lck);
if (XLByteLT(WriteRqstPtr, xlogctl-LogwrtRqst.Write))
WriteRqstPtr = xlogctl-LogwrtRqst.Write;
LogwrtResult = xlogctl-LogwrtResult;
SpinLockRelease(xlogctl-info_lck);
! /* done already? */
! if (XLByteLE(record, LogwrtResult.Flush))
! break;
!
! /*
! * Try to get the write lock. If we can't get it immediately, wait
! * until it's released, and recheck if we still need to do the flush
! * or if the backend that held the lock did it for us already. This
! * helps to maintain a good rate of group committing when the system
! * is bottlenecked by the speed of fsyncing.
! */
! if (!LWLockWaitUntilFree(WALWriteLock, LW_EXCLUSIVE))
! {
! /*
! * The lock is now free, but we didn't acquire it yet. Before we
! * do, loop back to check if someone else flushed the record for
! * us already.
! */
! continue;
! }
! /* Got the
Re: [HACKERS] Group commit, revised
On Fri, Jan 27, 2012 at 8:35 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: Yeah, we have to be careful with any overhead in there, it can be a hot spot. I wouldn't expect any measurable difference from the above, though. Could I ask you to rerun the pgbench tests you did recently with this patch? Or can you think of a better test for this? I can't do so immediately, because I'm waiting for Nate Boley to tell me I can go ahead and start testing on that machine again. But I will do it once I get the word. -- Robert Haas EnterpriseDB: http://www.enterprisedb.com The Enterprise PostgreSQL Company -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
I've been thinking, what exactly is the important part of this group
commit patch that gives the benefit? Keeping the queue sorted isn't all
that important - XLogFlush() requests for commits will come in almost
the correct order anyway.
I also don't much like the division of labour between groupcommit.c and
xlog.c. XLogFlush() calls GroupCommitWaitForLSN(), which calls back
DoXLogFlush(), which is a bit hard to follow. (that's in my latest
version; the original patch had similar division but it also cut across
processes, with the wal writer actually doing the flush)
It occurs to me that the WALWriteLock already provides much of the same
machinery we're trying to build here. It provides FIFO-style queuing,
with the capability to wake up the next process or processes in the
queue. Perhaps all we need is some new primitive to LWLock, to make it
do exactly what we need.
Attached is a patch to do that. It adds a new mode to
LWLockConditionalAcquire(), LW_EXCLUSIVE_BUT_WAIT. If the lock is free,
it is acquired and the function returns immediately. However, unlike
normal LWLockConditionalAcquire(), if the lock is not free it goes to
sleep until it is released. But unlike normal LWLockAcquire(), when the
lock is released, the function returns *without* acquiring the lock.
I modified XLogFlush() to use that new function for WALWriteLock. It
tries to get WALWriteLock, but if it's not immediately free, it waits
until it is released. Then, before trying to acquire the lock again, it
rechecks LogwrtResult to see if the record was already flushed by the
process that released the lock.
This is a much smaller patch than the group commit patch, and in my
pgbench-tools tests on my laptop, it has the same effect on performance.
The downside is that it touches lwlock.c, which is a change at a lower
level. Robert's flexlocks patch probably would've been useful here.
--
Heikki Linnakangas
EnterpriseDB http://www.enterprisedb.com
diff --git a/src/backend/access/transam/xlog.c b/src/backend/access/transam/xlog.c
index ce659ec..d726a98 100644
--- a/src/backend/access/transam/xlog.c
+++ b/src/backend/access/transam/xlog.c
@@ -2066,23 +2066,42 @@ XLogFlush(XLogRecPtr record)
/* initialize to given target; may increase below */
WriteRqstPtr = record;
- /* read LogwrtResult and update local state */
+ /*
+ * Now wait until we get the write lock, or someone else does the
+ * flush for us.
+ */
+ for (;;)
{
/* use volatile pointer to prevent code rearrangement */
volatile XLogCtlData *xlogctl = XLogCtl;
+ /* read LogwrtResult and update local state */
SpinLockAcquire(xlogctl-info_lck);
if (XLByteLT(WriteRqstPtr, xlogctl-LogwrtRqst.Write))
WriteRqstPtr = xlogctl-LogwrtRqst.Write;
LogwrtResult = xlogctl-LogwrtResult;
SpinLockRelease(xlogctl-info_lck);
- }
- /* done already? */
- if (!XLByteLE(record, LogwrtResult.Flush))
- {
- /* now wait for the write lock */
- LWLockAcquire(WALWriteLock, LW_EXCLUSIVE);
+ /* done already? */
+ if (XLByteLE(record, LogwrtResult.Flush))
+ break;
+
+ /*
+ * Try to get the write lock. If we can't get it immediately, wait
+ * until it's released, but before actually acquiring it, loop back
+ * to check if the backend holding the lock did the flush for us
+ * already. This helps to maintain a good rate of group committing
+ * when the system is bottlenecked by the speed of fsyncing.
+ */
+ if (!LWLockConditionalAcquire(WALWriteLock, LW_EXCLUSIVE_BUT_WAIT))
+ {
+ /*
+ * Didn't get the lock straight away, but we might be done
+ * already
+ */
+ continue;
+ }
+ /* Got the lock */
LogwrtResult = XLogCtl-Write.LogwrtResult;
if (!XLByteLE(record, LogwrtResult.Flush))
{
@@ -2111,6 +2130,8 @@ XLogFlush(XLogRecPtr record)
XLogWrite(WriteRqst, false, false);
}
LWLockRelease(WALWriteLock);
+ /* done */
+ break;
}
END_CRIT_SECTION();
diff --git a/src/backend/storage/lmgr/lwlock.c b/src/backend/storage/lmgr/lwlock.c
index cc41568..488f573 100644
--- a/src/backend/storage/lmgr/lwlock.c
+++ b/src/backend/storage/lmgr/lwlock.c
@@ -430,6 +430,7 @@ LWLockAcquire(LWLockId lockid, LWLockMode mode)
elog(PANIC, cannot wait without a PGPROC structure);
proc-lwWaiting = true;
+ proc-lwWaitOnly = false;
proc-lwExclusive = (mode == LW_EXCLUSIVE);
proc-lwWaitLink = NULL;
if (lock-head == NULL)
@@ -496,7 +497,9 @@ LWLockAcquire(LWLockId lockid, LWLockMode mode)
/*
* LWLockConditionalAcquire - acquire a lightweight lock in the specified mode
*
- * If the lock is not available, return FALSE with no side-effects.
+ * If the lock is not available, return FALSE with no side-effects. In
+ * LW_EXCLUSIVE_BUT_WAIT mode, if the lock is not available, waits until it
+ * is available, but then returns false without acquiring it.
*
* If successful, cancel/die interrupts are held off until lock release.
*/
@@ -504,7 +507,9 @@ bool
LWLockConditionalAcquire(LWLockId lockid,
Re: [HACKERS] Group commit, revised
On Wed, Jan 25, 2012 at 3:11 AM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I've been thinking, what exactly is the important part of this group commit patch that gives the benefit? Keeping the queue sorted isn't all that important - XLogFlush() requests for commits will come in almost the correct order anyway. I also don't much like the division of labour between groupcommit.c and xlog.c. XLogFlush() calls GroupCommitWaitForLSN(), which calls back DoXLogFlush(), which is a bit hard to follow. (that's in my latest version; the original patch had similar division but it also cut across processes, with the wal writer actually doing the flush) It occurs to me that the WALWriteLock already provides much of the same machinery we're trying to build here. It provides FIFO-style queuing, with the capability to wake up the next process or processes in the queue. Perhaps all we need is some new primitive to LWLock, to make it do exactly what we need. Attached is a patch to do that. It adds a new mode to LWLockConditionalAcquire(), LW_EXCLUSIVE_BUT_WAIT. If the lock is free, it is acquired and the function returns immediately. However, unlike normal LWLockConditionalAcquire(), if the lock is not free it goes to sleep until it is released. But unlike normal LWLockAcquire(), when the lock is released, the function returns *without* acquiring the lock. I modified XLogFlush() to use that new function for WALWriteLock. It tries to get WALWriteLock, but if it's not immediately free, it waits until it is released. Then, before trying to acquire the lock again, it rechecks LogwrtResult to see if the record was already flushed by the process that released the lock. This is a much smaller patch than the group commit patch, and in my pgbench-tools tests on my laptop, it has the same effect on performance. The downside is that it touches lwlock.c, which is a change at a lower level. Robert's flexlocks patch probably would've been useful here. I think you should break this off into a new function, LWLockWaitUntilFree(), rather than treating it as a new LWLockMode. Also, instead of adding lwWaitOnly, I would suggest that we generalize lwWaiting and lwExclusive into a field lwWaitRequest, which can be set to 1 for exclusive, 2 for shared, 3 for wait-for-free, etc. That way we don't have to add another boolean every time someone invents a new type of wait - not that that should hopefully happen very often. A side benefit of this is that you can simplify the test in LWLockRelease(): keep releasing waiters until you come to an exclusive waiter, then stop. This possibly saves one shared memory fetch and subsequent test instruction, which might not be trivial - all of this code is extremely hot. We probably want to benchmark this carefully to make sure that it doesn't cause a performance regression even just from this: + if (!proc-lwWaitOnly) + lock-releaseOK = false; I know it sounds crazy, but I'm not 100% sure that that additional test there is cheap enough not to matter. Assuming it is, though, I kind of like the concept: I think there must be other places where these semantics are useful. -- Robert Haas EnterpriseDB: http://www.enterprisedb.com The Enterprise PostgreSQL Company -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Fri, Jan 20, 2012 at 10:30 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I spent some time cleaning this up. Details below, but here are the highlights: * Reverted the removal of wal_writer_delay * Removed heuristic on big flushes No contested viewpoints on anything there. * Doesn't rely on WAL writer. Any process can act as the leader now. * Uses PGSemaphoreLock/Unlock instead of latches Thanks for producing an alternate version, it will allow us to comment on various approaches. There is much yet to discuss so please don't think about committing anything yet. -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Thu, Jan 19, 2012 at 10:46 PM, Peter Geoghegan pe...@2ndquadrant.com wrote: On 19 January 2012 17:40, Robert Haas robertmh...@gmail.com wrote: I don't know what you mean by this. I think removing wal_writer_delay is premature, because I think it still may have some utility, and the patch removes it. That's a separate change that should be factored out of this patch and discussed separately. FWIW, I don't really care too much if we keep wal_writer_delay, provided it is only used in place of the patch's WALWRITER_NORMAL_TIMEOUT constant. I will note in passing that I doubt that the effect with asynchronous commits and hint bits is pronounced enough to have ever transferred through to someone making a practical recommendation to reduce wal_writer_delay to ameliorate clog contention. It was very visible in some benchmarking Heikki did, and I was able to reproduce it. Yeah, I guess the shutdown sequence could get a bit complex if we try to make everyone go through the WAL writer all the time. But I wonder if we could rejiggering things somehow so that everything goes through WAL writer if its dead. I'm not sure what you mean by this last bit. It sounds a bit hazardous. That last if was supposed to say unless, which may contribute to the confusion. My problem with nominating a backend to the status of an auxiliary is that no matter what way you cut it, it increases the failure surface area, so to speak. I think that's the wrong way of thinking about it. Imagine this: we maintain a queue of people who are waiting on the current WAL flush, the current-flush-to LSN, and a queue of people who are waiting on the next WAL flush, and a leader. All this data is protected by a spinlock. When you want to flush WAL, you grab the spinlock. If the current-flush-to LSN is greater than the LSN you need, you add yourself to the waiting-on-current-flush queue, release the spinlock, and go to sleep. Otherwise, if there's no leader, you become the leader, enter your flush LSN as the current-flush-to-LSN, and release the spinlock. If there is a leader, you add yourself to the waiting-on-next-flush queue, release the spinlock, and sleep. If you become the leader, you perform the flush. Then you retake the spinlock, dequeue anyone waiting on the current flush, move all of the next flush waiters (or those within a certain LSN distance) to the current flush list, remember who is at the head of that new queue, and release the spinlock. You then set a flag in the PGPROC of the backend now at the head of the next-flush queue and wake him up; he checks that flag on waking to know whether he is the leader or whether he's just been woken because his flush is done. After waking him so the next flush can get started, you wake all the people who were waiting on the flush you already did. This may or may not be a good design, but I don't think it has any more failure surface area than what you have here. In particular, whether or not the WAL writer is running doesn't matter; the system can run just fine without it, and can even still do group commit. To look at it another way, it's not a question of whether we're treating a regular backend as an auxiliary process; there's no rule anywhere that backends can't be dependent on the proper operation of other backends for proper functioning - there are MANY places that have that property, including LWLockAcquire() and LWLockRelease(). Nor is there any rule that background processes are more reliable than foreground processes, nor do I believe they are. Much of the existing patch's failure surface seems to me to come from the coordination it requires between ordinary backends and the background writer, and possible race conditions appertaining thereto: WAL writer dies, backend dies, postmaster dies, postmaster and WAL writer die together, etc. + if (delta XLOG_SEG_SIZE * CheckPointSegments || + !ProcGlobal-groupCommitAvailable) That seems like a gigantic value. I would think that we'd want to forget about group commit any time we're behind by more than one segment (maybe less). I'm sure that you're right - I myself described it as horrible in my original mail. I think that whatever value we set this to ought to be well reasoned. Right now, your magic number doesn't seem much better than my bogus heuristic (which only ever served as a placeholder implementation that hinted at a well-principled formula). What's your basis for suggesting that that limit would always be close to optimal? It's probably not - I suspect even a single WAL segment still too large. I'm pretty sure that it would be safe to always flush up to the next block boundary, because we always write the whole block anyway even if it's only partially filled. So there's no possible regression there. Anything larger than the end of the current 8kB block is going to be a trade-off between latency and throughput, and it seems to me that there's
Re: [HACKERS] Group commit, revised
I spent some time cleaning this up. Details below, but here are the highlights: * Reverted the removal of wal_writer_delay * Doesn't rely on WAL writer. Any process can act as the leader now. * Removed heuristic on big flushes * Uses PGSemaphoreLock/Unlock instead of latches On 20.01.2012 17:30, Robert Haas wrote: On Thu, Jan 19, 2012 at 10:46 PM, Peter Geogheganpe...@2ndquadrant.com wrote: + if (delta XLOG_SEG_SIZE * CheckPointSegments || + !ProcGlobal-groupCommitAvailable) That seems like a gigantic value. I would think that we'd want to forget about group commit any time we're behind by more than one segment (maybe less). I'm sure that you're right - I myself described it as horrible in my original mail. I think that whatever value we set this to ought to be well reasoned. Right now, your magic number doesn't seem much better than my bogus heuristic (which only ever served as a placeholder implementation that hinted at a well-principled formula). What's your basis for suggesting that that limit would always be close to optimal? It's probably not - I suspect even a single WAL segment still too large. I'm pretty sure that it would be safe to always flush up to the next block boundary, because we always write the whole block anyway even if it's only partially filled. So there's no possible regression there. Anything larger than the end of the current 8kB block is going to be a trade-off between latency and throughput, and it seems to me that there's probably only one way to figure out what's reasonable: test a bunch of different values and see which ones perform well in practice. Maybe we could answer part of the question by writing a test program which does repeated sequential writes of increasingly-large chunks of data. We might find out for example that 64kB is basically the same as 8kB because most of the overhead is in the system call anyway, but beyond that the curve kinks. Or it may be that 16kB is already twice as slow as 8kB, or that you can go up to 1MB without a problem. I don't see a way to know that without testing it on a couple different pieces of hardware and seeing what happens. I ripped away that heuristic for a flush that's too large. After pondering it for a while, I came to the conclusion that as implemented in the patch, it was pointless. The thing is, if the big flush doesn't go through the group commit machinery, it's going to grab the WALWriteLock straight away. Before any smaller commits can proceed, they will need to grab that lock anyway, so the effect is the same as if the big flush had just joined the queue. Maybe we should have a heuristic to split a large flush into smaller chunks. The WAL segment boundary would be a quite natural split point, for example, because when crossing the file boundary you have to issue separate fsync()s for the files anyway. But I'm happy with leaving that out for now, it's not any worse than it used to be without group commit anyway. Ugh. Our current system doesn't even require this code to be interruptible, I think: you can't receive cancel or die interrupts either while waiting for an LWLock or while holding it. Right. Or within HOLD/RESUME_INTERRUPTS blocks. The patch added some CHECK_FOR_INTERRUPTS() calls into various places in the commit/abort codepaths, but that's all dead code; they're all within a HOLD/RESUME_INTERRUPTS blocks. I replaced the usage of latches with the more traditional PGSemaphoreLock/Unlock. It semaphore model works just fine in this case, where we have a lwlock to guard the wait queue, and when a process is waiting we know it will be woken up or something messed up at a pretty low level. We don't need a timeout or to wake up at other signals while waiting. Furthermore, the WAL writer didn't have a latch before this patch; it's not many lines of code to initialize the latch and set up the signal handler for it, but it already has a semaphore that's ready to use. I wonder if we should rename the file into xlogflush.c or something like that, to make it clear that this works with any XLOG flushes, not just commits? Group commit is the usual term for this feature, so we should definitely mention that in the comments, but it might be better to rename the files/functions to emphasize that this is about WAL flushing in general. This probably needs some further cleanup to fix things I've broken, and I haven't done any performance testing, but it's progress. Do you have a shell script or something that you used for the performance tests that I could run? Or would you like to re-run the tests you did earlier with this patch? -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com *** a/doc/src/sgml/config.sgml --- b/doc/src/sgml/config.sgml *** *** 1760,1809 SET ENABLE_SEQSCAN TO OFF; /listitem /varlistentry - varlistentry id=guc-commit-delay xreflabel=commit_delay -
Re: [HACKERS] Group commit, revised
On 20 January 2012 22:30, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: Maybe we should have a heuristic to split a large flush into smaller chunks. The WAL segment boundary would be a quite natural split point, for example, because when crossing the file boundary you have to issue separate fsync()s for the files anyway. But I'm happy with leaving that out for now, it's not any worse than it used to be without group commit anyway. Let's quantify how much of a problem that is first. The patch added some CHECK_FOR_INTERRUPTS() calls into various places in the commit/abort codepaths, but that's all dead code; they're all within a HOLD/RESUME_INTERRUPTS blocks. Fair enough, but do you think it's acceptable to say well, we can't have errors within critical blocks anyway, and nor can the driver, so just assume that the driver will successfully service the request? Furthermore, the WAL writer didn't have a latch before this patch; it's not many lines of code to initialize the latch and set up the signal handler for it, but it already has a semaphore that's ready to use. Uh, yes it did - WalWriterDelay is passed to WaitLatch(). It didn't use the process latch as I did (which is initialised anyway), though I believe it should have (on general principal, to avoid invalidation issues when generic handlers are registered, plus because the process latch is already initialised and available), which is why I changed it. Whatever you do with group commit, you're going to want to look at the changes made to the WAL Writer in my original patch outside of the main loop, because there are one or two fixes for it included (registering a usr1 signal handler and saving errno in existing handlers), and because we need an alternative way of power saving if you're not going to include the mechanism originally proposed - maybe something similar to what has been done for the BGWriter in my patch for that. At 5 wake-ups per second by default, the process is by a wide margin the biggest culprit (except BGWriter, which is also 5 by default, but that is addressed by my other patch that you're reviewing). I want to fix that problem too, and possibly investigate if there's something to be done about the checkpointer (though that only has a 5 second timeout, so it's not a major concern). In any case, we should encourage the idea that auxiliary processes will use the proc latch, unless perhaps they only use a local latch like the avlauncher does, imho. Why did you remove the new assertions in unix_latch.c/win32_latch.c? I think you should keep them, as well as my additional comments on latch timeout invalidation issues in latch.h which are untouched in your revision (though this looks to be a rough revision, so I shouldn't read anything into that either way I suppose). In general, we should try and use the process latch whenever we can. I wonder if we should rename the file into xlogflush.c or something like that, to make it clear that this works with any XLOG flushes, not just commits? Group commit is the usual term for this feature, so we should definitely mention that in the comments, but it might be better to rename the files/functions to emphasize that this is about WAL flushing in general. Okay. This probably needs some further cleanup to fix things I've broken, and I haven't done any performance testing, but it's progress. Do you have a shell script or something that you used for the performance tests that I could run? Or would you like to re-run the tests you did earlier with this patch? No, I'm using pgbench-tools, and there's no reason to think that you couldn't get similar results on ordinary hardware, which is all I used - obviously you'll want to make sure that you're using a file system that supports granular fsyncs, like ext4. All of the details, including the config for pgbench-tools, are in my original e-mail. I have taken the time to re-run the benchmark and update the wiki with that new information - I'd call it a draw. -- Peter Geoghegan http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training and Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 21 January 2012 03:13, Peter Geoghegan pe...@2ndquadrant.com wrote: I have taken the time to re-run the benchmark and update the wiki with that new information - I'd call it a draw. On second though, the occasional latency spikes that we see with my patch (which uses the poll() based latch in the run that is benchmarked) might be significant - difficult to say. The averages are about the same though. -- Peter Geoghegan http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training and Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Wed, Jan 18, 2012 at 5:38 PM, Simon Riggs si...@2ndquadrant.com wrote: On Wed, Jan 18, 2012 at 1:23 AM, Robert Haas robertmh...@gmail.com wrote: On Tue, Jan 17, 2012 at 12:37 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I found it very helpful to reduce wal_writer_delay in pgbench tests, when running with synchronous_commit=off. The reason is that hint bits don't get set until the commit record is flushed to disk, so making the flushes more frequent reduces the contention on the clog. However, Simon made async commits nudge WAL writer if the WAL page fills up, so I'm not sure how relevant that experience is anymore. Still completely relevant and orthogonal to this discussion. The patch retains multi-modal behaviour. I don't know what you mean by this. I think removing wal_writer_delay is premature, because I think it still may have some utility, and the patch removes it. That's a separate change that should be factored out of this patch and discussed separately. There's still a small but measurable effect there in master. I think we might be able to make it fully auto-tuning, but I don't think we're fully there yet (not sure how much this patch changes that equation). I suggested a design similar to the one you just proposed to Simon when he originally suggested this feature. It seems that if the WAL writer is the only one doing WAL flushes, then there must be some IPC overhead - and context switching - involved whenever WAL is flushed. But clearly we're saving something somewhere else, on the basis of Peter's results, so maybe it's not worth worrying about. It does seem pretty odd to have all the regular backends going through the WAL writer and the auxiliary processes using a different mechanism, though. If we got rid of that, maybe WAL writer wouldn't even require a lock, if there's only one process that can be doing it at a time. When we did sync rep it made sense to have the WALSender do the work and for others to just wait. It would be quite strange to require a different design for essentially the same thing for normal commits and WAL flushes to local disk. I should mention the original proposal for streaming replication had each backend send data to standby independently and that was recognised as a bad idea after some time. Same for sync rep also. I don't think those cases are directly comparable. SR is talking to another machine, and I can't imagine that there is a terribly convenient or portable way for every backend that needs one to get a hold of the file descriptor for the socket. Even if it could, the data is sent as a stream, so if multiple backends sent to the same file descriptor you'd have to have some locking to prevent messages from getting interleaved. Or else you could have multiple connections, or use UDP, but that gets rather complex. Anyway, none of this is an issue for file I/O: anybody can open the file, and if two backends write data at different offsets at the same time - or the same data at the same offset at the same time - there's no problem. So the fact that it wasn't a good idea for SR doesn't convince me that it's also a bad idea here. On the other hand, I'm not saying we *should* do it that way, either - i.e. I am not trying to require a different design just because it's fun to make people change things. Rather, I am trying to figure out whether the design you've chosen is in fact the best one, and part of that involves reasoning about why it might or might not be. There are obvious reasons to think that having process A kick process B and go to sleep, then have process B do some work and wake up process A might be less efficient than having process A just do the work itself, in the uncontended case. The fact that that isn't happening seems awfully strange to me; it's hard to understand why 3 system calls are faster than one. That suggests that either the current system is badly broken in some way that this patch fixes (in which case, it would be nice to know what the broken thing is) or that there's an opportunity for further optimization of the new patch (either now or later, depending on how much work we're talking about). Just to be clear, it makes perfect sense that the new system is faster in the contended case, and the benchmark numbers are very impressive. It's a lot harder to understand why it's not slower in the uncontended case. Not sure why its odd to have backends do one thing and auxiliaries do another. The whole point of auxiliary processes is that they do a specific thing different to normal backends. Anyway, the important thing is to have auxiliary processes be independent of each other as much as possible, which simplifies error handling and state logic in the postmaster. Yeah, I guess the shutdown sequence could get a bit complex if we try to make everyone go through the WAL writer all the time. But I wonder if we could rejiggering things somehow so that
Re: [HACKERS] Group commit, revised
On 19 January 2012 17:40, Robert Haas robertmh...@gmail.com wrote: I don't know what you mean by this. I think removing wal_writer_delay is premature, because I think it still may have some utility, and the patch removes it. That's a separate change that should be factored out of this patch and discussed separately. FWIW, I don't really care too much if we keep wal_writer_delay, provided it is only used in place of the patch's WALWRITER_NORMAL_TIMEOUT constant. I will note in passing that I doubt that the effect with asynchronous commits and hint bits is pronounced enough to have ever transferred through to someone making a practical recommendation to reduce wal_writer_delay to ameliorate clog contention. When we did sync rep it made sense to have the WALSender do the work and for others to just wait. It would be quite strange to require a different design for essentially the same thing for normal commits and WAL flushes to local disk. I should mention the original proposal for streaming replication had each backend send data to standby independently and that was recognised as a bad idea after some time. Same for sync rep also. I don't think those cases are directly comparable. SR is talking to another machine, and I can't imagine that there is a terribly convenient or portable way for every backend that needs one to get a hold of the file descriptor for the socket. Even if it could, the data is sent as a stream, so if multiple backends sent to the same file descriptor you'd have to have some locking to prevent messages from getting interleaved. Or else you could have multiple connections, or use UDP, but that gets rather complex. Anyway, none of this is an issue for file I/O: anybody can open the file, and if two backends write data at different offsets at the same time - or the same data at the same offset at the same time - there's no problem. So the fact that it wasn't a good idea for SR doesn't convince me that it's also a bad idea here. On the other hand, I'm not saying we *should* do it that way, either - i.e. I am not trying to require a different design just because it's fun to make people change things. Rather, I am trying to figure out whether the design you've chosen is in fact the best one, and part of that involves reasoning about why it might or might not be. There are obvious reasons to think that having process A kick process B and go to sleep, then have process B do some work and wake up process A might be less efficient than having process A just do the work itself, in the uncontended case. The fact that that isn't happening seems awfully strange to me; it's hard to understand why 3 system calls are faster than one. That suggests that either the current system is badly broken in some way that this patch fixes (in which case, it would be nice to know what the broken thing is) or that there's an opportunity for further optimization of the new patch (either now or later, depending on how much work we're talking about). Just to be clear, it makes perfect sense that the new system is faster in the contended case, and the benchmark numbers are very impressive. It's a lot harder to understand why it's not slower in the uncontended case. Not sure why its odd to have backends do one thing and auxiliaries do another. The whole point of auxiliary processes is that they do a specific thing different to normal backends. Anyway, the important thing is to have auxiliary processes be independent of each other as much as possible, which simplifies error handling and state logic in the postmaster. Yeah, I guess the shutdown sequence could get a bit complex if we try to make everyone go through the WAL writer all the time. But I wonder if we could rejiggering things somehow so that everything goes through WAL writer if its dead. I'm not sure what you mean by this last bit. It sounds a bit hazardous. My problem with nominating a backend to the status of an auxiliary is that no matter what way you cut it, it increases the failure surface area, so to speak. I'm not sure why Heikki thinks that it follows that having a dependency on some backend is simpler than having one on an auxiliary process. As to the question of IPC and context switch overhead, I'd speculate that protecting access to a data structure with book keeping information regarding which backend is currently the driver and so on might imply considerably more overhead than IPC and context switching. It might also be that having WAL Writer almost solely responsible for this might facilitate more effective use of CPU cache. On most modern architectures, system calls don't actually cause a full context switch. The kernel can just enter a mode switch (go from user mode to kernel mode, and then back to user mode). You can observe this effect with vmstat. That's how 3 system calls might not look much more expensive than 1. + if (delta XLOG_SEG_SIZE * CheckPointSegments
Re: [HACKERS] Group commit, revised
On Wed, Jan 18, 2012 at 1:23 AM, Robert Haas robertmh...@gmail.com wrote: On Tue, Jan 17, 2012 at 12:37 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I found it very helpful to reduce wal_writer_delay in pgbench tests, when running with synchronous_commit=off. The reason is that hint bits don't get set until the commit record is flushed to disk, so making the flushes more frequent reduces the contention on the clog. However, Simon made async commits nudge WAL writer if the WAL page fills up, so I'm not sure how relevant that experience is anymore. Still completely relevant and orthogonal to this discussion. The patch retains multi-modal behaviour. There's still a small but measurable effect there in master. I think we might be able to make it fully auto-tuning, but I don't think we're fully there yet (not sure how much this patch changes that equation). I suggested a design similar to the one you just proposed to Simon when he originally suggested this feature. It seems that if the WAL writer is the only one doing WAL flushes, then there must be some IPC overhead - and context switching - involved whenever WAL is flushed. But clearly we're saving something somewhere else, on the basis of Peter's results, so maybe it's not worth worrying about. It does seem pretty odd to have all the regular backends going through the WAL writer and the auxiliary processes using a different mechanism, though. If we got rid of that, maybe WAL writer wouldn't even require a lock, if there's only one process that can be doing it at a time. When we did sync rep it made sense to have the WALSender do the work and for others to just wait. It would be quite strange to require a different design for essentially the same thing for normal commits and WAL flushes to local disk. I should mention the original proposal for streaming replication had each backend send data to standby independently and that was recognised as a bad idea after some time. Same for sync rep also. The gain is that previously there was measurable contention for the WALWriteLock, now there is none. Plus the gang effect continues to work even when the database gets busy, which isn't true of piggyback commits as we use now. Not sure why its odd to have backends do one thing and auxiliaries do another. The whole point of auxiliary processes is that they do a specific thing different to normal backends. Anyway, the important thing is to have auxiliary processes be independent of each other as much as possible, which simplifies error handling and state logic in the postmaster. With regard to context switching, we're making a kernel call to fsync, so we'll get a context switch anyway. The whole process is similar to the way lwlock wake up works. -- Simon Riggs http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 16 January 2012 08:11, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: Impressive results. How about uploading the PDF to the community wiki? Sure. http://wiki.postgresql.org/wiki/Group_commit . I think it might be simpler if it wasn't the background writer that's responsible for driving the group commit queue, but the backends themselves. When a flush request comes in, you join the queue, and if someone else is already doing the flush, sleep until the driver wakes you up. If no-one is doing the flush yet (ie. the queue is empty), start doing it yourself. You'll need a state variable to keep track who's driving the queue, but otherwise I think it would be simpler as there would be no dependency on WAL writer. I think this replaces one problem with another. You've now effectively elevated a nominated backend to the status of an auxiliary process - do you intend to have the postmaster look after it, as with any other auxiliary process? I'm not sure that that is a more difficult problem to solve, but I suspect so. At least my proposal can have any one of the backends, both currently participating in group commit and yet to, wake up the WAL Writer. I tend think of the group commit facility as a bus. Passengers can hop on board at any time, and they take turns on who drives the bus. When the first passengers hops in, there is no driver so he takes the driver seat. When the next passenger hops in, he sees that someone is driving the bus already, so he sits down, and places a big sign on his forehead stating the bus stop where he wants to get off, and goes to sleep. When the driver has reached his own bus stop, he wakes up all the passengers who wanted to get off at the same stop or any of the earlier stops [1]. He also wakes up the passenger whose bus stop is the farthest from the current stop, and gets off the bus. The woken-up passengers who have already reached their stops can immediately get off the bus, and the one who has not notices that no-one is driving the bus anymore, so he takes the driver seat. [1] in a real bus, a passenger would not be happy if he's woken up too late and finds himself at the next stop instead of the one where he wanted to go, but for group commit, that is fine. In this arrangement, you could use the per-process semaphore for the sleep/wakeups, instead of latches. I'm not sure if there's any difference, but semaphores are more tried and tested, at least. Yes, and I expect that this won't be the last time someone uses a bus analogy in relation to this! The proposed patch is heavily based on sync rep, which I'd have imagined was more tried and tested than any proposed completely alternative implementation, as it is basically a generalisation of exactly the same principle, WAL Writer changes notwithstanding. I would have imagined that that aspect would be particularly approved of. wal_writer_delay is still needed for controlling how often asynchronous commits are flushed to disk. That had occurred to me of course, but has anyone ever actually tweaked wal_writer_delay with adjusting the behaviour of asynchronous commits in mind? I'm pretty sure that the answer is no. I have a slight preference for obsoleting it as a consequence of introducing group commit, but I don't think that it matters that much. Auxiliary processes cannot use group commit. The changes made prevent them from availing of commit_siblings/commit_delay parallelism, because it doesn't exist anymore. Auxiliary processes have PGPROC entries too. Why can't they participate? It was deemed to be a poor design decision to effectively create a dependency on the WAL Writer among other auxiliary processes, as to do so would perhaps compromise the way in which the postmaster notices and corrects isolated failures. Maybe I'll revisit that assessment, but I am not convinced that it's worth the very careful analysis of the implications of such an unprecedented dependency, without there being some obvious advantage. It it's a question of their being deprived of commit_siblings group commit, well, we know from experience that people didn't tend to touch it a whole lot anyway. Group commit is sometimes throttled, which seems appropriate - if a backend requests that the WAL Writer flush an LSN deemed too far from the known flushed point, that request is rejected and the backend goes through another path, where XLogWrite() is called. Hmm, if the backend doing the big flush gets the WALWriteLock before a bunch of group committers, the group committers will have to wait until the big flush is finished, anyway. I presume the idea of the throttling is to avoid the situation where a bunch of small commits need to wait for a huge flush to finish. Exactly. Of course, you're never going to see that situation with pgbench. I don't have much data to inform exactly what the right trade-off is here, or some generic approximation of it across platforms and hardware - other
Re: [HACKERS] Group commit, revised
On 17.01.2012 16:35, Peter Geoghegan wrote: On 16 January 2012 08:11, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I think it might be simpler if it wasn't the background writer that's responsible for driving the group commit queue, but the backends themselves. When a flush request comes in, you join the queue, and if someone else is already doing the flush, sleep until the driver wakes you up. If no-one is doing the flush yet (ie. the queue is empty), start doing it yourself. You'll need a state variable to keep track who's driving the queue, but otherwise I think it would be simpler as there would be no dependency on WAL writer. I think this replaces one problem with another. You've now effectively elevated a nominated backend to the status of an auxiliary process - do you intend to have the postmaster look after it, as with any other auxiliary process? The GroupCommitWaitForLSN() call happens within a critical section. If the process dies, you're screwed no matter what. It's not very different from the current situation where if one backend flushes the WAL, another backend will notice that once it gets the WALWriteLock, and returns quickly. wal_writer_delay is still needed for controlling how often asynchronous commits are flushed to disk. That had occurred to me of course, but has anyone ever actually tweaked wal_writer_delay with adjusting the behaviour of asynchronous commits in mind? I found it very helpful to reduce wal_writer_delay in pgbench tests, when running with synchronous_commit=off. The reason is that hint bits don't get set until the commit record is flushed to disk, so making the flushes more frequent reduces the contention on the clog. However, Simon made async commits nudge WAL writer if the WAL page fills up, so I'm not sure how relevant that experience is anymore. -- Heikki Linnakangas EnterpriseDB http://www.enterprisedb.com -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 17 January 2012 17:37, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I found it very helpful to reduce wal_writer_delay in pgbench tests, when running with synchronous_commit=off. The reason is that hint bits don't get set until the commit record is flushed to disk, so making the flushes more frequent reduces the contention on the clog. However, Simon made async commits nudge WAL writer if the WAL page fills up, so I'm not sure how relevant that experience is anymore. It's quite possible that the WAL Writer will spin continuously, if given enough work to do, with this patch. Although it's hard to tell from the graph I sent, there is a modest improvement in TPS for even a single client. See the tables in the PDF. -- Peter Geoghegan http://www.2ndQuadrant.com/ PostgreSQL Development, 24x7 Support, Training and Services -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On Jan 15, 2012, at 4:42 PM, Peter Geoghegan wrote:
Attached is a patch that myself and Simon Riggs collaborated on. I
took the group commit patch that Simon posted to the list back in
November, and partially rewrote it.
Forgive me if this is a dumb question, but I noticed a few places doing things
like:
if (...)
Blah();
else
{
...
}
Is that allowed PG formatting? I thought that if braces were required on one
branch of an if they were supposed to go on both sides.
Also, I didn't see any README changes in the patch... perhaps this is big
enough to warrant them?
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Re: [HACKERS] Group commit, revised
Excerpts from Jim Nasby's message of mar ene 17 21:21:57 -0300 2012:
On Jan 15, 2012, at 4:42 PM, Peter Geoghegan wrote:
Attached is a patch that myself and Simon Riggs collaborated on. I
took the group commit patch that Simon posted to the list back in
November, and partially rewrote it.
Forgive me if this is a dumb question, but I noticed a few places doing
things like:
if (...)
Blah();
else
{
...
}
Is that allowed PG formatting? I thought that if braces were required on one
branch of an if they were supposed to go on both sides.
Yeah, we even used to have pg_indent remove braces around single
statements, so if you had one statement in the if branch and more
around the other one, pg_indent would have left things like that anyway.
(This particular pg_indent behavior got removed because it messed up
PG_TRY blocks.)
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Re: [HACKERS] Group commit, revised
On Tue, Jan 17, 2012 at 12:37 PM, Heikki Linnakangas heikki.linnakan...@enterprisedb.com wrote: I found it very helpful to reduce wal_writer_delay in pgbench tests, when running with synchronous_commit=off. The reason is that hint bits don't get set until the commit record is flushed to disk, so making the flushes more frequent reduces the contention on the clog. However, Simon made async commits nudge WAL writer if the WAL page fills up, so I'm not sure how relevant that experience is anymore. There's still a small but measurable effect there in master. I think we might be able to make it fully auto-tuning, but I don't think we're fully there yet (not sure how much this patch changes that equation). I suggested a design similar to the one you just proposed to Simon when he originally suggested this feature. It seems that if the WAL writer is the only one doing WAL flushes, then there must be some IPC overhead - and context switching - involved whenever WAL is flushed. But clearly we're saving something somewhere else, on the basis of Peter's results, so maybe it's not worth worrying about. It does seem pretty odd to have all the regular backends going through the WAL writer and the auxiliary processes using a different mechanism, though. If we got rid of that, maybe WAL writer wouldn't even require a lock, if there's only one process that can be doing it at a time. What happens in standalone mode? -- Robert Haas EnterpriseDB: http://www.enterprisedb.com The Enterprise PostgreSQL Company -- Sent via pgsql-hackers mailing list (pgsql-hackers@postgresql.org) To make changes to your subscription: http://www.postgresql.org/mailpref/pgsql-hackers
Re: [HACKERS] Group commit, revised
On 16.01.2012 00:42, Peter Geoghegan wrote: I've also attached the results of a pgbench-tools driven benchmark, which are quite striking (Just the most relevant image - e-mail me privately if you'd like a copy of the full report, as I don't want to send a large PDF file to the list as a courtesy to others). Apart from the obvious improvement in throughput, there is also a considerable improvement in average and worst latency at all client counts. Impressive results. How about uploading the PDF to the community wiki? The main way that I've added value here is by refactoring and fixing bugs. There were some tricky race conditions that caused the regression tests to fail for that early draft patch, but there were a few other small bugs too. There is an unprecedented latch pattern introduced by this patch: Two processes (the WAL Writer and any given connection backend) have a mutual dependency. Only one may sleep, in which case the other is responsible for waking it. Much of the difficulty in debugging this patch, and much of the complexity that I've added, came from preventing both from simultaneously sleeping, even in the face of various known failure modes like postmaster death. If this happens, it does of course represent a denial-of-service, so that's something that reviewers are going to want to heavily scrutinise. I suppose that sync rep should be fine here, as it waits on walsenders, but I haven't actually comprehensively tested the patch, so there may be undiscovered unpleasant interactions with other xlog related features. I can report that it passes the regression tests successfully, and on an apparently consistently basis - I battled with intermittent failures for a time. I think it might be simpler if it wasn't the background writer that's responsible for driving the group commit queue, but the backends themselves. When a flush request comes in, you join the queue, and if someone else is already doing the flush, sleep until the driver wakes you up. If no-one is doing the flush yet (ie. the queue is empty), start doing it yourself. You'll need a state variable to keep track who's driving the queue, but otherwise I think it would be simpler as there would be no dependency on WAL writer. I tend think of the group commit facility as a bus. Passengers can hop on board at any time, and they take turns on who drives the bus. When the first passengers hops in, there is no driver so he takes the driver seat. When the next passenger hops in, he sees that someone is driving the bus already, so he sits down, and places a big sign on his forehead stating the bus stop where he wants to get off, and goes to sleep. When the driver has reached his own bus stop, he wakes up all the passengers who wanted to get off at the same stop or any of the earlier stops [1]. He also wakes up the passenger whose bus stop is the farthest from the current stop, and gets off the bus. The woken-up passengers who have already reached their stops can immediately get off the bus, and the one who has not notices that no-one is driving the bus anymore, so he takes the driver seat. [1] in a real bus, a passenger would not be happy if he's woken up too late and finds himself at the next stop instead of the one where he wanted to go, but for group commit, that is fine. In this arrangement, you could use the per-process semaphore for the sleep/wakeups, instead of latches. I'm not sure if there's any difference, but semaphores are more tried and tested, at least. The benefits (and, admittedly, the controversies) of this patch go beyond mere batching of commits: it also largely, though not entirely, obviates the need for user backends to directly write/flush WAL, and the WAL Writer may never sleep if it continually finds work to do - wal_writer_delay is obsoleted, as are commit_siblings and commit_delay. wal_writer_delay is still needed for controlling how often asynchronous commits are flushed to disk. Auxiliary processes cannot use group commit. The changes made prevent them from availing of commit_siblings/commit_delay parallelism, because it doesn't exist anymore. Auxiliary processes have PGPROC entries too. Why can't they participate? Group commit is sometimes throttled, which seems appropriate - if a backend requests that the WAL Writer flush an LSN deemed too far from the known flushed point, that request is rejected and the backend goes through another path, where XLogWrite() is called. Hmm, if the backend doing the big flush gets the WALWriteLock before a bunch of group committers, the group committers will have to wait until the big flush is finished, anyway. I presume the idea of the throttling is to avoid the situation where a bunch of small commits need to wait for a huge flush to finish. Perhaps the big flusher should always join the queue, but use some heuristic to first flush up to the previous commit request, to wake up others quickly, and do another flush to flush
[HACKERS] Group commit, revised
Attached is a patch that myself and Simon Riggs collaborated on. I took the group commit patch that Simon posted to the list back in November, and partially rewrote it. Here is that original thread: http://archives.postgresql.org/pgsql-hackers/2011-11/msg00802.php I've also attached the results of a pgbench-tools driven benchmark, which are quite striking (Just the most relevant image - e-mail me privately if you'd like a copy of the full report, as I don't want to send a large PDF file to the list as a courtesy to others). Apart from the obvious improvement in throughput, there is also a considerable improvement in average and worst latency at all client counts. To recap, the initial impetus to pursue this idea came from the observation that with sync rep, we could get massive improvements in the transactions-per-second throughput by simply adding clients. Greg Smith performed a benchmark while in Amsterdam for the PgConf.EU conference, which was discussed in a talk there. Over an inter-continental connection from Amsterdam to his office in Baltimore on the U.S. east coast, he saw TPS as reported by pgbench on what I suppose was either an insert or update workload grow from a mere 10 TPS for a single connection to over 2000 TPS for about 300 connections. That was with the large, inherent latency imposed by those sorts of distances (3822 miles/ 6150 km, about a 100ms ping time on a decent connection). Quite obviously, as clients were added, the server was able to batch increasing numbers of commits in each confirmation message, resulting in this effect. The main way that I've added value here is by refactoring and fixing bugs. There were some tricky race conditions that caused the regression tests to fail for that early draft patch, but there were a few other small bugs too. There is an unprecedented latch pattern introduced by this patch: Two processes (the WAL Writer and any given connection backend) have a mutual dependency. Only one may sleep, in which case the other is responsible for waking it. Much of the difficulty in debugging this patch, and much of the complexity that I've added, came from preventing both from simultaneously sleeping, even in the face of various known failure modes like postmaster death. If this happens, it does of course represent a denial-of-service, so that's something that reviewers are going to want to heavily scrutinise. I suppose that sync rep should be fine here, as it waits on walsenders, but I haven't actually comprehensively tested the patch, so there may be undiscovered unpleasant interactions with other xlog related features. I can report that it passes the regression tests successfully, and on an apparently consistently basis - I battled with intermittent failures for a time. Simon's original patch largely copied the syncrep.c code as an expedient to prove the concept. Obviously this design was never intended to get committed, and I've done some commonality and variability analysis, refactoring to considerably slim down the new groupcommit.c file by exposing some previously module-private functions from syncrep.c . I encourage others to reproduce my benchmark here. I attach a pgbench-tools config. You can get the latest version of the tool at: https://github.com/gregs1104/pgbench-tools I also attach hdparm information for the disk that was used during these benchmarks. Note that I have not disabled the write cache. It's a Linux box, with ext4, running a recent kernel. The benefits (and, admittedly, the controversies) of this patch go beyond mere batching of commits: it also largely, though not entirely, obviates the need for user backends to directly write/flush WAL, and the WAL Writer may never sleep if it continually finds work to do - wal_writer_delay is obsoleted, as are commit_siblings and commit_delay. I suspect that they will not be missed. Of course, it does all this to facilitate group commit itself. The group commit feature does not have a GUC to control it, as this seems like something that would be fairly pointless to turn off. FWIW, this is currently the case for the recently introduced Maria DB group commit implementation. Auxiliary processes cannot use group commit. The changes made prevent them from availing of commit_siblings/commit_delay parallelism, because it doesn't exist anymore. Group commit is sometimes throttled, which seems appropriate - if a backend requests that the WAL Writer flush an LSN deemed too far from the known flushed point, that request is rejected and the backend goes through another path, where XLogWrite() is called. Currently the group commit infrastructure decides that on the sole basis of there being a volume of WAL that is equivalent in size to checkpoint_segments between the two points. This is probably a fairly horrible heuristic, not least since it overloads checkpoint_segments, but is of course only a first-pass effort. Bright ideas are always welcome. Thoughts? -- Peter Geoghegan
