- 06 Mar, 2019 40 commits
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Mel Gorman authored
As compaction proceeds and creates high-order blocks, the free list search gets less efficient as the larger blocks are used as compaction targets. Eventually, the larger blocks will be behind the migration scanner for partially migrated pageblocks and the search fails. This patch round-robins what orders are searched so that larger blocks can be ignored and find smaller blocks that can be used as migration targets. The overall impact was small on 1-socket but it avoids corner cases where the migration/free scanners meet prematurely or situations where many of the pageblocks encountered by the free scanner are almost full instead of being properly packed. Previous testing had indicated that without this patch there were occasional large spikes in the free scanner without this patch. [dan.carpenter@oracle.com: fix static checker warning] Link: http://lkml.kernel.org/r/20190118175136.31341-20-mgorman@techsingularity.netSigned-off-by:
Mel Gorman <mgorman@techsingularity.net> Acked-by:
Vlastimil Babka <vbabka@suse.cz> Cc: Andrea Arcangeli <aarcange@redhat.com> Cc: David Rientjes <rientjes@google.com> Cc: YueHaibing <yuehaibing@huawei.com> Signed-off-by:
Andrew Morton <akpm@linux-foundation.org> Signed-off-by:
Linus Torvalds <torvalds@linux-foundation.org>
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Mel Gorman authored
The fast isolation of free pages allows the cached PFN of the free scanner to advance faster than necessary depending on the contents of the free list. The key is that fast_isolate_freepages() can update zone->compact_cached_free_pfn via isolate_freepages_block(). When the fast search fails, the linear scan can start from a point that has skipped valid migration targets, particularly pageblocks with just low-order free pages. This can cause the migration source/target scanners to meet prematurely causing a reset. This patch starts by avoiding an update of the pageblock skip information and cached PFN from isolate_freepages_block() and puts the responsibility of updating that information in the callers. The fast scanner will update the cached PFN if and only if it finds a block that is higher than the existing cached PFN and sets the skip if the pageblock is full or nearly full. The linear scanner will update skipped information and the cached PFN only when a block is completely scanned. The total impact is that the free scanner advances more slowly as it is primarily driven by the linear scanner instead of the fast search. 5.0.0-rc1 5.0.0-rc1 noresched-v3r17 slowfree-v3r17 Amean fault-both-3 2965.68 ( 0.00%) 3036.75 ( -2.40%) Amean fault-both-5 3995.90 ( 0.00%) 4522.24 * -13.17%* Amean fault-both-7 5842.12 ( 0.00%) 6365.35 ( -8.96%) Amean fault-both-12 9550.87 ( 0.00%) 10340.93 ( -8.27%) Amean fault-both-18 13304.72 ( 0.00%) 14732.46 ( -10.73%) Amean fault-both-24 14618.59 ( 0.00%) 16288.96 ( -11.43%) Amean fault-both-30 16650.96 ( 0.00%) 16346.21 ( 1.83%) Amean fault-both-32 17145.15 ( 0.00%) 19317.49 ( -12.67%) The impact to latency is higher than the last version but it appears to be due to a slight increase in the free scan rates which is a potential side-effect of the patch. However, this is necessary for later patches that are more careful about how pageblocks are treated as earlier iterations of those patches hit corner cases where the restarts were punishing and very visible. Link: http://lkml.kernel.org/r/20190118175136.31341-19-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
Scanning on large machines can take a considerable length of time and eventually need to be rescheduled. This is treated as an abort event but that's not appropriate as the attempt is likely to be retried after making numerous checks and taking another cycle through the page allocator. This patch will check the need to reschedule if necessary but continue the scanning. The main benefit is reduced scanning when compaction is taking a long time or the machine is over-saturated. It also avoids an unnecessary exit of compaction that ends up being retried by the page allocator in the outer loop. 5.0.0-rc1 5.0.0-rc1 synccached-v3r16 noresched-v3r17 Amean fault-both-1 0.00 ( 0.00%) 0.00 * 0.00%* Amean fault-both-3 2958.27 ( 0.00%) 2965.68 ( -0.25%) Amean fault-both-5 4091.90 ( 0.00%) 3995.90 ( 2.35%) Amean fault-both-7 5803.05 ( 0.00%) 5842.12 ( -0.67%) Amean fault-both-12 9481.06 ( 0.00%) 9550.87 ( -0.74%) Amean fault-both-18 14141.51 ( 0.00%) 13304.72 ( 5.92%) Amean fault-both-24 16438.00 ( 0.00%) 14618.59 ( 11.07%) Amean fault-both-30 17531.72 ( 0.00%) 16650.96 ( 5.02%) Amean fault-both-32 17101.96 ( 0.00%) 17145.15 ( -0.25%) Link: http://lkml.kernel.org/r/20190118175136.31341-18-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
With incremental changes, compact_should_abort no longer makes any documented sense. Rename to compact_check_resched and update the associated comments. There is no benefit other than reducing redundant code and making the intent slightly clearer. It could potentially be merged with earlier patches but it just makes the review slightly harder. Link: http://lkml.kernel.org/r/20190118175136.31341-17-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
Migrate has separate cached PFNs for ASYNC and SYNC* migration on the basis that some migrations will fail in ASYNC mode. However, if the cached PFNs match at the start of scanning and pageblocks are skipped due to having no isolation candidates, then the sync state does not matter. This patch keeps matching cached PFNs in sync until a pageblock with isolation candidates is found. The actual benefit is marginal given that the sync scanner following the async scanner will often skip a number of pageblocks but it's useless work. Any benefit depends heavily on whether the scanners restarted recently. Link: http://lkml.kernel.org/r/20190118175136.31341-16-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
When scanning for sources or targets, PageCompound is checked for huge pages as they can be skipped quickly but it happens relatively late after a lot of setup and checking. This patch short-cuts the check to make it earlier. It might still change when the lock is acquired but this has less overhead overall. The free scanner advances but the migration scanner does not. Typically the free scanner encounters more movable blocks that change state over the lifetime of the system and also tends to scan more aggressively as it's actively filling its portion of the physical address space with data. This could change in the future but for the moment, this worked better in practice and incurred fewer scan restarts. The impact on latency and allocation success rates is marginal but the free scan rates are reduced by 15% and system CPU usage is reduced by 3.3%. The 2-socket results are not materially different. Link: http://lkml.kernel.org/r/20190118175136.31341-15-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
Async migration aborts on spinlock contention but contention can be high when there are multiple compaction attempts and kswapd is active. The consequence is that the migration scanners move forward uselessly while still contending on locks for longer while leaving suitable migration sources behind. This patch will acquire the lock but track when contention occurs. When it does, the current pageblock will finish as compaction may succeed for that block and then abort. This will have a variable impact on latency as in some cases useless scanning is avoided (reduces latency) but a lock will be contended (increase latency) or a single contended pageblock is scanned that would otherwise have been skipped (increase latency). 5.0.0-rc1 5.0.0-rc1 norescan-v3r16 finishcontend-v3r16 Amean fault-both-1 0.00 ( 0.00%) 0.00 * 0.00%* Amean fault-both-3 3002.07 ( 0.00%) 3153.17 ( -5.03%) Amean fault-both-5 4684.47 ( 0.00%) 4280.52 ( 8.62%) Amean fault-both-7 6815.54 ( 0.00%) 5811.50 * 14.73%* Amean fault-both-12 10864.02 ( 0.00%) 9276.85 ( 14.61%) Amean fault-both-18 12247.52 ( 0.00%) 11032.67 ( 9.92%) Amean fault-both-24 15683.99 ( 0.00%) 14285.70 ( 8.92%) Amean fault-both-30 18620.02 ( 0.00%) 16293.76 * 12.49%* Amean fault-both-32 19250.28 ( 0.00%) 16721.02 * 13.14%* 5.0.0-rc1 5.0.0-rc1 norescan-v3r16 finishcontend-v3r16 Percentage huge-1 0.00 ( 0.00%) 0.00 ( 0.00%) Percentage huge-3 95.00 ( 0.00%) 96.82 ( 1.92%) Percentage huge-5 94.22 ( 0.00%) 95.40 ( 1.26%) Percentage huge-7 92.35 ( 0.00%) 95.92 ( 3.86%) Percentage huge-12 91.90 ( 0.00%) 96.73 ( 5.25%) Percentage huge-18 89.58 ( 0.00%) 96.77 ( 8.03%) Percentage huge-24 90.03 ( 0.00%) 96.05 ( 6.69%) Percentage huge-30 89.14 ( 0.00%) 96.81 ( 8.60%) Percentage huge-32 90.58 ( 0.00%) 97.41 ( 7.54%) There is a variable impact that is mostly good on latency while allocation success rates are slightly higher. System CPU usage is reduced by about 10% but scan rate impact is mixed Compaction migrate scanned 27997659.00 20148867 Compaction free scanned 120782791.00 118324914 Migration scan rates are reduced 28% which is expected as a pageblock is used by the async scanner instead of skipped. The impact on the free scanner is known to be variable. Overall the primary justification for this patch is that completing scanning of a pageblock is very important for later patches. [yuehaibing@huawei.com: fix unused variable warning] Link: http://lkml.kernel.org/r/20190118175136.31341-14-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
Pageblocks are marked for skip when no pages are isolated after a scan. However, it's possible to hit corner cases where the migration scanner gets stuck near the boundary between the source and target scanner. Due to pages being migrated in blocks of COMPACT_CLUSTER_MAX, pages that are migrated can be reallocated before the pageblock is complete. The pageblock is not necessarily skipped so it can be rescanned multiple times. Similarly, a pageblock with some dirty/writeback pages may fail to migrate and be rescanned until writeback completes which is wasteful. This patch tracks if a pageblock is being rescanned. If so, then the entire pageblock will be migrated as one operation. This narrows the race window during which pages can be reallocated during migration. Secondly, if there are pages that cannot be isolated then the pageblock will still be fully scanned and marked for skipping. On the second rescan, the pageblock skip is set and the migration scanner makes progress. 5.0.0-rc1 5.0.0-rc1 findfree-v3r16 norescan-v3r16 Amean fault-both-1 0.00 ( 0.00%) 0.00 * 0.00%* Amean fault-both-3 3200.68 ( 0.00%) 3002.07 ( 6.21%) Amean fault-both-5 4847.75 ( 0.00%) 4684.47 ( 3.37%) Amean fault-both-7 6658.92 ( 0.00%) 6815.54 ( -2.35%) Amean fault-both-12 11077.62 ( 0.00%) 10864.02 ( 1.93%) Amean fault-both-18 12403.97 ( 0.00%) 12247.52 ( 1.26%) Amean fault-both-24 15607.10 ( 0.00%) 15683.99 ( -0.49%) Amean fault-both-30 18752.27 ( 0.00%) 18620.02 ( 0.71%) Amean fault-both-32 21207.54 ( 0.00%) 19250.28 * 9.23%* 5.0.0-rc1 5.0.0-rc1 findfree-v3r16 norescan-v3r16 Percentage huge-3 96.86 ( 0.00%) 95.00 ( -1.91%) Percentage huge-5 93.72 ( 0.00%) 94.22 ( 0.53%) Percentage huge-7 94.31 ( 0.00%) 92.35 ( -2.08%) Percentage huge-12 92.66 ( 0.00%) 91.90 ( -0.82%) Percentage huge-18 91.51 ( 0.00%) 89.58 ( -2.11%) Percentage huge-24 90.50 ( 0.00%) 90.03 ( -0.52%) Percentage huge-30 91.57 ( 0.00%) 89.14 ( -2.65%) Percentage huge-32 91.00 ( 0.00%) 90.58 ( -0.46%) Negligible difference but this was likely a case when the specific corner case was not hit. A previous run of the same patch based on an earlier iteration of the series showed large differences where migration rates could be halved when the corner case was hit. The specific corner case where migration scan rates go through the roof was due to a dirty/writeback pageblock located at the boundary of the migration/free scanner did not happen in this case. When it does happen, the scan rates multipled by massive margins. Link: http://lkml.kernel.org/r/20190118175136.31341-13-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
Similar to the migration scanner, this patch uses the free lists to quickly locate a migration target. The search is different in that lower orders will be searched for a suitable high PFN if necessary but the search is still bound. This is justified on the grounds that the free scanner typically scans linearly much more than the migration scanner. If a free page is found, it is isolated and compaction continues if enough pages were isolated. For SYNC* scanning, the full pageblock is scanned for any remaining free pages so that is can be marked for skipping in the near future. 1-socket thpfioscale 5.0.0-rc1 5.0.0-rc1 isolmig-v3r15 findfree-v3r16 Amean fault-both-3 3024.41 ( 0.00%) 3200.68 ( -5.83%) Amean fault-both-5 4749.30 ( 0.00%) 4847.75 ( -2.07%) Amean fault-both-7 6454.95 ( 0.00%) 6658.92 ( -3.16%) Amean fault-both-12 10324.83 ( 0.00%) 11077.62 ( -7.29%) Amean fault-both-18 12896.82 ( 0.00%) 12403.97 ( 3.82%) Amean fault-both-24 13470.60 ( 0.00%) 15607.10 * -15.86%* Amean fault-both-30 17143.99 ( 0.00%) 18752.27 ( -9.38%) Amean fault-both-32 17743.91 ( 0.00%) 21207.54 * -19.52%* The impact on latency is variable but the search is optimistic and sensitive to the exact system state. Success rates are similar but the major impact is to the rate of scanning 5.0.0-rc1 5.0.0-rc1 isolmig-v3r15 findfree-v3r16 Compaction migrate scanned 25646769 29507205 Compaction free scanned 201558184 100359571 The free scan rates are reduced by 50%. The 2-socket reductions for the free scanner are more dramatic which is a likely reflection that the machine has more memory. [dan.carpenter@oracle.com: fix static checker warning] [vbabka@suse.cz: correct number of pages scanned for lower orders] Link: http://lkml.kernel.org/r/20190118175136.31341-12-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
Due to either a fast search of the free list or a linear scan, it is possible for multiple compaction instances to pick the same pageblock for migration. This is lucky for one scanner and increased scanning for all the others. It also allows a race between requests on which first allocates the resulting free block. This patch tests and updates the pageblock skip for the migration scanner carefully. When isolating a block, it will check and skip if the block is already in use. Once the zone lock is acquired, it will be rechecked so that only one scanner can set the pageblock skip for exclusive use. Any scanner contending will continue with a linear scan. The skip bit is still set if no pages can be isolated in a range. While this may result in redundant scanning, it avoids unnecessarily acquiring the zone lock when there are no suitable migration sources. 1-socket thpscale Amean fault-both-1 0.00 ( 0.00%) 0.00 * 0.00%* Amean fault-both-3 3390.40 ( 0.00%) 3024.41 ( 10.80%) Amean fault-both-5 5082.28 ( 0.00%) 4749.30 ( 6.55%) Amean fault-both-7 7012.51 ( 0.00%) 6454.95 ( 7.95%) Amean fault-both-12 11346.63 ( 0.00%) 10324.83 ( 9.01%) Amean fault-both-18 15324.19 ( 0.00%) 12896.82 * 15.84%* Amean fault-both-24 16088.50 ( 0.00%) 13470.60 * 16.27%* Amean fault-both-30 18723.42 ( 0.00%) 17143.99 ( 8.44%) Amean fault-both-32 18612.01 ( 0.00%) 17743.91 ( 4.66%) 5.0.0-rc1 5.0.0-rc1 findmig-v3r15 isolmig-v3r15 Percentage huge-3 89.83 ( 0.00%) 92.96 ( 3.48%) Percentage huge-5 91.96 ( 0.00%) 93.26 ( 1.41%) Percentage huge-7 92.85 ( 0.00%) 93.63 ( 0.84%) Percentage huge-12 92.74 ( 0.00%) 92.80 ( 0.07%) Percentage huge-18 91.71 ( 0.00%) 91.62 ( -0.10%) Percentage huge-24 92.13 ( 0.00%) 91.50 ( -0.69%) Percentage huge-30 93.79 ( 0.00%) 92.73 ( -1.13%) Percentage huge-32 91.27 ( 0.00%) 91.94 ( 0.74%) This shows a reasonable reduction in latency as multiple compaction scanners do not operate on the same blocks with a similar allocation success rate. Compaction migrate scanned 41093126 25646769 Migration scan rates are reduced by 38%. Link: http://lkml.kernel.org/r/20190118175136.31341-11-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
The migration scanner is a linear scan of a zone with a potentiall large search space. Furthermore, many pageblocks are unusable such as those filled with reserved pages or partially filled with pages that cannot migrate. These still get scanned in the common case of allocating a THP and the cost accumulates. The patch uses a partial search of the free lists to locate a migration source candidate that is marked as MOVABLE when allocating a THP. It prefers picking a block with a larger number of free pages already on the basis that there are fewer pages to migrate to free the entire block. The lowest PFN found during searches is tracked as the basis of the start for the linear search after the first search of the free list fails. After the search, the free list is shuffled so that the next search will not encounter the same page. If the search fails then the subsequent searches will be shorter and the linear scanner is used. If this search fails, or if the request is for a small or unmovable/reclaimable allocation then the linear scanner is still used. It is somewhat pointless to use the list search in those cases. Small free pages must be used for the search and there is no guarantee that movable pages are located within that block that are contiguous. 5.0.0-rc1 5.0.0-rc1 noboost-v3r10 findmig-v3r15 Amean fault-both-3 3771.41 ( 0.00%) 3390.40 ( 10.10%) Amean fault-both-5 5409.05 ( 0.00%) 5082.28 ( 6.04%) Amean fault-both-7 7040.74 ( 0.00%) 7012.51 ( 0.40%) Amean fault-both-12 11887.35 ( 0.00%) 11346.63 ( 4.55%) Amean fault-both-18 16718.19 ( 0.00%) 15324.19 ( 8.34%) Amean fault-both-24 21157.19 ( 0.00%) 16088.50 * 23.96%* Amean fault-both-30 21175.92 ( 0.00%) 18723.42 * 11.58%* Amean fault-both-32 21339.03 ( 0.00%) 18612.01 * 12.78%* 5.0.0-rc1 5.0.0-rc1 noboost-v3r10 findmig-v3r15 Percentage huge-3 86.50 ( 0.00%) 89.83 ( 3.85%) Percentage huge-5 92.52 ( 0.00%) 91.96 ( -0.61%) Percentage huge-7 92.44 ( 0.00%) 92.85 ( 0.44%) Percentage huge-12 92.98 ( 0.00%) 92.74 ( -0.25%) Percentage huge-18 91.70 ( 0.00%) 91.71 ( 0.02%) Percentage huge-24 91.59 ( 0.00%) 92.13 ( 0.60%) Percentage huge-30 90.14 ( 0.00%) 93.79 ( 4.04%) Percentage huge-32 90.03 ( 0.00%) 91.27 ( 1.37%) This shows an improvement in allocation latencies with similar allocation success rates. While not presented, there was a 31% reduction in migration scanning and a 8% reduction on system CPU usage. A 2-socket machine showed similar benefits. [mgorman@techsingularity.net: several fixes] Link: http://lkml.kernel.org/r/20190204120111.GL9565@techsingularity.net [vbabka@suse.cz: migrate block that was found-fast, some optimisations] Link: http://lkml.kernel.org/r/20190118175136.31341-10-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
When pageblocks get fragmented, watermarks are artifically boosted to reclaim pages to avoid further fragmentation events. However, compaction is often either fragmentation-neutral or moving movable pages away from unmovable/reclaimable pages. As the true watermarks are preserved, allow compaction to ignore the boost factor. The expected impact is very slight as the main benefit is that compaction is slightly more likely to succeed when the system has been fragmented very recently. On both 1-socket and 2-socket machines for THP-intensive allocation during fragmentation the success rate was increased by less than 1% which is marginal. However, detailed tracing indicated that failure of migration due to a premature ENOMEM triggered by watermark checks were eliminated. Link: http://lkml.kernel.org/r/20190118175136.31341-9-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
When compaction is finishing, it uses a flag to ensure the pageblock is complete but it makes sense to always complete migration of a pageblock. Minimally, skip information is based on a pageblock and partially scanned pageblocks may incur more scanning in the future. The pageblock skip handling also becomes more strict later in the series and the hint is more useful if a complete pageblock was always scanned. The potentially impacts latency as more scanning is done but it's not a consistent win or loss as the scanning is not always a high percentage of the pageblock and sometimes it is offset by future reductions in scanning. Hence, the results are not presented this time due to a misleading mix of gains/losses without any clear pattern. However, full scanning of the pageblock is important for later patches. Link: http://lkml.kernel.org/r/20190118175136.31341-8-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
Pages with no migration handler use a fallback handler which sometimes works and sometimes persistently retries. A historical example was blockdev pages but there are others such as odd refcounting when page->private is used. These are retried multiple times which is wasteful during compaction so this patch will fail migration faster unless the caller specifies MIGRATE_SYNC. This is not expected to help THP allocation success rates but it did reduce latencies very slightly in some cases. 1-socket thpfioscale 4.20.0 4.20.0 noreserved-v2r15 failfast-v2r15 Amean fault-both-1 0.00 ( 0.00%) 0.00 * 0.00%* Amean fault-both-3 3839.67 ( 0.00%) 3833.72 ( 0.15%) Amean fault-both-5 5177.47 ( 0.00%) 4967.15 ( 4.06%) Amean fault-both-7 7245.03 ( 0.00%) 7139.19 ( 1.46%) Amean fault-both-12 11534.89 ( 0.00%) 11326.30 ( 1.81%) Amean fault-both-18 16241.10 ( 0.00%) 16270.70 ( -0.18%) Amean fault-both-24 19075.91 ( 0.00%) 19839.65 ( -4.00%) Amean fault-both-30 22712.11 ( 0.00%) 21707.05 ( 4.43%) Amean fault-both-32 21692.92 ( 0.00%) 21968.16 ( -1.27%) The 2-socket results are not materially different. Scan rates are similar as expected. Link: http://lkml.kernel.org/r/20190118175136.31341-7-mgorman@techsingularity.netSigned-off-by: -
Mel Gorman authored
It's non-obvious that high-order free pages are split into order-0 pages from the function name. Fix it. Link: http://lkml.kernel.org/r/20190118175136.31341-6-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
A zone parameter is passed into a number of top-level compaction functions despite the fact that it's already in compact_control. This is harmless but it did need an audit to check if zone actually ever changes meaningfully. This patches removes the parameter in a number of top-level functions. The change could be much deeper but this was enough to briefly clarify the flow. No functional change. Link: http://lkml.kernel.org/r/20190118175136.31341-5-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
The last_migrated_pfn field is a bit dubious as to whether it really helps but either way, the information from it can be inferred without increasing the size of compact_control so remove the field. Link: http://lkml.kernel.org/r/20190118175136.31341-4-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
compact_control spans two cache lines with write-intensive lines on both. Rearrange so the most write-intensive fields are in the same cache line. This has a negligible impact on the overall performance of compaction and is more a tidying exercise than anything. Link: http://lkml.kernel.org/r/20190118175136.31341-3-mgorman@techsingularity.netSigned-off-by:
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Mel Gorman authored
Patch series "Increase success rates and reduce latency of compaction", v3. This series reduces scan rates and success rates of compaction, primarily by using the free lists to shorten scans, better controlling of skip information and whether multiple scanners can target the same block and capturing pageblocks before being stolen by parallel requests. The series is based on mmotm from January 9th, 2019 with the previous compaction series reverted. I'm mostly using thpscale to measure the impact of the series. The benchmark creates a large file, maps it, faults it, punches holes in the mapping so that the virtual address space is fragmented and then tries to allocate THP. It re-executes for different numbers of threads. From a fragmentation perspective, the workload is relatively benign but it does stress compaction. The overall impact on latencies for a 1-socket machine is baseline patches Amean fault-both-3 3832.09 ( 0.00%) 2748.56 * 28.28%* Amean fault-both-5 4933.06 ( 0.00%) 4255.52 ( 13.73%) Amean fault-both-7 7017.75 ( 0.00%) 6586.93 ( 6.14%) Amean fault-both-12 11610.51 ( 0.00%) 9162.34 * 21.09%* Amean fault-both-18 17055.85 ( 0.00%) 11530.06 * 32.40%* Amean fault-both-24 19306.27 ( 0.00%) 17956.13 ( 6.99%) Amean fault-both-30 22516.49 ( 0.00%) 15686.47 * 30.33%* Amean fault-both-32 23442.93 ( 0.00%) 16564.83 * 29.34%* The allocation success rates are much improved baseline patches Percentage huge-3 85.99 ( 0.00%) 97.96 ( 13.92%) Percentage huge-5 88.27 ( 0.00%) 96.87 ( 9.74%) Percentage huge-7 85.87 ( 0.00%) 94.53 ( 10.09%) Percentage huge-12 82.38 ( 0.00%) 98.44 ( 19.49%) Percentage huge-18 83.29 ( 0.00%) 99.14 ( 19.04%) Percentage huge-24 81.41 ( 0.00%) 97.35 ( 19.57%) Percentage huge-30 80.98 ( 0.00%) 98.05 ( 21.08%) Percentage huge-32 80.53 ( 0.00%) 97.06 ( 20.53%) That's a nearly perfect allocation success rate. The biggest impact is on the scan rates Compaction migrate scanned 55893379 19341254 Compaction free scanned 474739990 11903963 The number of pages scanned for migration was reduced by 65% and the free scanner was reduced by 97.5%. So much less work in exchange for lower latency and better success rates. The series was also evaluated using a workload that heavily fragments memory but the benefits there are also significant, albeit not presented. It was commented that we should be rethinking scanning entirely and to a large extent I agree. However, to achieve that you need a lot of this series in place first so it's best to make the linear scanners as best as possible before ripping them out. This patch (of 22): The isolate and migrate scanners should never isolate more than a pageblock of pages so unsigned int is sufficient saving 8 bytes on a 64-bit build. Link: http://lkml.kernel.org/r/20190118175136.31341-2-mgorman@techsingularity.netSigned-off-by:
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zhengbin authored
The 'end_byte' parameter of filemap_range_has_page is required to be inclusive, so follow the rule. Link: http://lkml.kernel.org/r/1548678679-18122-1-git-send-email-zhengbin13@huawei.com Fixes: 6be96d3a ("fs: return if direct I/O will trigger writeback") Signed-off-by:
zhengbin <zhengbin13@huawei.com> Reviewed-by:
Matthew Wilcox <willy@infradead.org> Acked-by:
Christoph Hellwig <hch@lst.de> Cc: "Darrick J. Wong" <darrick.wong@oracle.com> Cc: Amir Goldstein <amir73il@gmail.com> Cc: Dave Chinner <david@fromorbit.com> Cc: Johannes Weiner <hannes@cmpxchg.org> Cc: Hugh Dickins <hughd@google.com> Cc: Hou Tao <houtao1@huawei.com> Cc: zhangyi (F) <yi.zhang@huawei.com> Cc: Jan Kara <jack@suse.cz> Signed-off-by:
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Alexey Dobriyan authored
GFP_KERNEL is one of the most used constant but on archs like arm with fixed length instruction some constants are more equal than the others. Constants with tightly packed bits can be injected directly into instruction stream: 0: e3a00d33 mov r0, #3264 ; 0xcc0 Others require multiple instructions or even loading out of instruction stream: 0: e3a000c0 mov r0, #192 ; 0xc0 4: e3400060 movt r0, #96 ; 0x60 Shuffle GFP_* flags so that GFP_KERNEL/GFP_ATOMIC + __GFP_ZERO bits are close to each other. Savings on arm configs are ~0.1%. Link: http://lkml.kernel.org/r/20190109201838.GA9140@avx2Signed-off-by:
Alexey Dobriyan <adobriyan@gmail.com> Reviewed-by:
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Yang Shi authored
swap_vma_readahead()'s comment is missing, just add it. Link: http://lkml.kernel.org/r/1546543673-108536-2-git-send-email-yang.shi@linux.alibaba.comSigned-off-by:
Yang Shi <yang.shi@linux.alibaba.com> Reviewed-by:
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Yang Shi authored
Swap readahead would read in a few pages regardless if the underlying device is busy or not. It may incur long waiting time if the device is congested, and it may also exacerbate the congestion. Use inode_read_congested() to check if the underlying device is busy or not like what file page readahead does. Get inode from swap_info_struct. Although we can add inode information in swap_address_space (address_space->host), it may lead some unexpected side effect, i.e. it may break mapping_cap_account_dirty(). Using inode from swap_info_struct seems simple and good enough. Just does the check in vma_cluster_readahead() since swap_vma_readahead() is just used for non-rotational device which much less likely has congestion than traditional HDD. Although swap slots may be consecutive on swap partition, it still may be fragmented on swap file. This check would help to reduce excessive stall for such case. The test with page_fault1 of will-it-scale (sometimes tracing may just show runtest.py that is the wrapper script of page_fault1), which basically launches NR_CPU threads to generate 128MB anonymous pages for each thread, on my virtual machine with congested HDD shows long tail latency is reduced significantly. Without the patch page_fault1_thr-1490 [023] 129.311706: funcgraph_entry: #57377.796 us | do_swap_page(); page_fault1_thr-1490 [023] 129.369103: funcgraph_entry: 5.642us | do_swap_page(); page_fault1_thr-1490 [023] 129.369119: funcgraph_entry: #1289.592 us | do_swap_page(); page_fault1_thr-1490 [023] 129.370411: funcgraph_entry: 4.957us | do_swap_page(); page_fault1_thr-1490 [023] 129.370419: funcgraph_entry: 1.940us | do_swap_page(); page_fault1_thr-1490 [023] 129.378847: funcgraph_entry: #1411.385 us | do_swap_page(); page_fault1_thr-1490 [023] 129.380262: funcgraph_entry: 3.916us | do_swap_page(); page_fault1_thr-1490 [023] 129.380275: funcgraph_entry: #4287.751 us | do_swap_page(); With the patch runtest.py-1417 [020] 301.925911: funcgraph_entry: #9870.146 us | do_swap_page(); runtest.py-1417 [020] 301.935785: funcgraph_entry: 9.802us | do_swap_page(); runtest.py-1417 [020] 301.935799: funcgraph_entry: 3.551us | do_swap_page(); runtest.py-1417 [020] 301.935806: funcgraph_entry: 2.142us | do_swap_page(); runtest.py-1417 [020] 301.935853: funcgraph_entry: 6.938us | do_swap_page(); runtest.py-1417 [020] 301.935864: funcgraph_entry: 3.765us | do_swap_page(); runtest.py-1417 [020] 301.935871: funcgraph_entry: 3.600us | do_swap_page(); runtest.py-1417 [020] 301.935878: funcgraph_entry: 7.202us | do_swap_page(); [akpm@linux-foundation.org: code cleanup] [yang.shi@linux.alibaba.com: add comment] Link: http://lkml.kernel.org/r/bbc7bda7-62d0-df1a-23ef-d369e865bdca@linux.alibaba.com Link: http://lkml.kernel.org/r/1546543673-108536-1-git-send-email-yang.shi@linux.alibaba.comSigned-off-by:Tim Chen <tim.c.chen@intel.com> Reviewed-by:
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Matthew Wilcox authored
After we establish a reference on the page, we check the pointer continues to be in the correct position in i_pages. Checking page->index afterwards is unnecessary; if it were to change, then the pointer to it from the page cache would also move. The check used to be done before grabbing a reference on the page which was racy (see commit 9cbb4cb2 ("mm: find_get_pages_contig fixlet")), but nobody noticed that moving the check after grabbing the reference was redundant. Link: http://lkml.kernel.org/r/20190107200224.13260-1-willy@infradead.orgSigned-off-by:
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Gustavo A. R. Silva authored
One of the more common cases of allocation size calculations is finding the size of a structure that has a zero-sized array at the end, along with memory for some number of elements for that array. For example: struct foo { int stuff; void *entry[]; }; instance = kmalloc(sizeof(struct foo) + sizeof(void *) * count, GFP_KERNEL); Instead of leaving these open-coded and prone to type mistakes, we can now use the new struct_size() helper: instance = kmalloc(struct_size(instance, entry, count), GFP_KERNEL); This code was detected with the help of Coccinelle. Link: http://lkml.kernel.org/r/20190104183726.GA6374@embeddedorSigned-off-by:Gustavo A. R. Silva <gustavo@embeddedor.com> Acked-by:
Michal Hocko <mhocko@suse.com> Cc: Johannes Weiner <hannes@cmpxchg.org> Cc: Vladimir Davydov <vdavydov.dev@gmail.com> Signed-off-by:
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Wei Yang authored
In the current implementation, there are two places to isolate a range of page: __offline_pages() and alloc_contig_range(). During this procedure, it will drain pages on pcp list. Below is a brief call flow: __offline_pages()/alloc_contig_range() start_isolate_page_range() set_migratetype_isolate() drain_all_pages() drain_all_pages() <--- A This snippet shows the current logic is isolate and drain pcp list for each pageblock and drain pcp list again for the whole range. start_isolate_page_range is responsible for isolating the given pfn range. One part of that job is to make sure that also pages that are on the allocator pcp lists are properly isolated. Otherwise they could be reused and the range wouldn't be completely isolated until the memory is freed back. While there is no strict guarantee here because pages might get allocated at any time before drain_all_pages is called there doesn't seem to be any strong demand for such a guarantee. In any case, draining is already done at the isolation level and there is no need to do it again later by start_isolate_page_range callers (memory hotplug and CMA allocator currently). Therefore remove pointless draining in existing callers to make the code more clear and functionally correct. [mhocko@suse.com: provide a clearer changelog for the last two paragraphs] Link: http://lkml.kernel.org/r/20190105233141.2329-1-richard.weiyang@gmail.comSigned-off-by:Wei Yang <richard.weiyang@gmail.com> Acked-by:
David Hildenbrand <david@redhat.com> Reviewed-by:
Oscar Salvador <osalvador@suse.de> Signed-off-by:
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Anshuman Khandual authored
Let arm64 subscribe to the previously added framework in which architecture can inform whether a given huge page size is supported for migration. This just overrides the default function arch_hugetlb_migration_supported() and enables migration for all possible HugeTLB page sizes on arm64. With this, HugeTLB migration support on arm64 now covers all possible HugeTLB options. CONT PTE PMD CONT PMD PUD -------- --- -------- --- 4K: 64K 2M 32M 1G 16K: 2M 32M 1G 64K: 2M 512M 16G Link: http://lkml.kernel.org/r/1545121450-1663-6-git-send-email-anshuman.khandual@arm.comSigned-off-by:Anshuman Khandual <anshuman.khandual@arm.com> Reviewed-by:
Naoya Horiguchi <n-horiguchi@ah.jp.nec.com> Reviewed-by:
Steve Capper <steve.capper@arm.com> Acked-by:
Catalin Marinas <catalin.marinas@arm.com> Cc: Michal Hocko <mhocko@kernel.org> Cc: Michal Hocko <mhocko@suse.com> Signed-off-by:
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Anshuman Khandual authored
Let arm64 subscribe to generic HugeTLB page migration framework. Right now this only works on the following PMD and PUD level HugeTLB page sizes with various kernel base page size combinations. CONT PTE PMD CONT PMD PUD -------- --- -------- --- 4K: NA 2M NA 1G 16K: NA 32M NA 64K: NA 512M NA Link: http://lkml.kernel.org/r/1545121450-1663-5-git-send-email-anshuman.khandual@arm.comSigned-off-by: -
Anshuman Khandual authored
Architectures like arm64 have HugeTLB page sizes which are different than generic sizes at PMD, PUD, PGD level and implemented via contiguous bits. At present these special size HugeTLB pages cannot be identified through macros like (PMD|PUD|PGDIR)_SHIFT and hence chosen not be migrated. Enabling migration support for these special HugeTLB page sizes along with the generic ones (PMD|PUD|PGD) would require identifying all of them on a given platform. A platform specific hook can precisely enumerate all huge page sizes supported for migration. Instead of comparing against standard huge page orders let hugetlb_migration_support() function call a platform hook arch_hugetlb_migration_support(). Default definition for the platform hook maintains existing semantics which checks standard huge page order. But an architecture can choose to override the default and provide support for a comprehensive set of huge page sizes. Link: http://lkml.kernel.org/r/1545121450-1663-4-git-send-email-anshuman.khandual@arm.comSigned-off-by:
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Anshuman Khandual authored
Architectures like arm64 have PUD level HugeTLB pages for certain configs (1GB huge page is PUD based on ARM64_4K_PAGES base page size) that can be enabled for migration. It can be achieved through checking for PUD_SHIFT order based HugeTLB pages during migration. Link: http://lkml.kernel.org/r/1545121450-1663-3-git-send-email-anshuman.khandual@arm.comSigned-off-by:
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Anshuman Khandual authored
Patch series "arm64/mm: Enable HugeTLB migration", v4. This patch series enables HugeTLB migration support for all supported huge page sizes at all levels including contiguous bit implementation. Following HugeTLB migration support matrix has been enabled with this patch series. All permutations have been tested except for the 16GB. CONT PTE PMD CONT PMD PUD -------- --- -------- --- 4K: 64K 2M 32M 1G 16K: 2M 32M 1G 64K: 2M 512M 16G First the series adds migration support for PUD based huge pages. It then adds a platform specific hook to query an architecture if a given huge page size is supported for migration while also providing a default fallback option preserving the existing semantics which just checks for (PMD|PUD|PGDIR)_SHIFT macros. The last two patches enables HugeTLB migration on arm64 and subscribe to this new platform specific hook by defining an override. The second patch differentiates between movability and migratability aspects of huge pages and implements hugepage_movable_supported() which can then be used during allocation to decide whether to place the huge page in movable zone or not. This patch (of 5): During huge page allocation it's migratability is checked to determine if it should be placed under movable zones with GFP_HIGHUSER_MOVABLE. But the movability aspect of the huge page could depend on other factors than just migratability. Movability in itself is a distinct property which should not be tied with migratability alone. This differentiates these two and implements an enhanced movability check which also considers huge page size to determine if it is feasible to be placed under a movable zone. At present it just checks for gigantic pages but going forward it can incorporate other enhanced checks. Link: http://lkml.kernel.org/r/1545121450-1663-2-git-send-email-anshuman.khandual@arm.comSigned-off-by:Michal Hocko <mhocko@kernel.org> Acked-by:
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Matthew Wilcox authored
sysctl_extfrag_handler() neglects to propagate the return value from proc_dointvec_minmax() to its caller. It's a wrapper that doesn't need to exist, so just use proc_dointvec_minmax() directly. Link: http://lkml.kernel.org/r/20190104032557.3056-1-willy@infradead.orgSigned-off-by:
Aditya Pakki <pakki001@umn.edu> Acked-by:
Randy Dunlap <rdunlap@infradead.org> Signed-off-by:
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Uladzislau Rezki (Sony) authored
Add the test script for the kernel test driver to analyse vmalloc allocator for benchmarking and stressing purposes. It is just a kernel module loader. You can specify and pass different parameters in order to investigate allocations behaviour. See "usage" output for more details. Also add basic vmalloc smoke test to the "run_vmtests" suite. Link: http://lkml.kernel.org/r/20190103142108.20744-4-urezki@gmail.comSigned-off-by:
Uladzislau Rezki (Sony) <urezki@gmail.com> Reviewed-by:
Shuah Khan <shuah@kernel.org> Cc: Kees Cook <keescook@chromium.org> Cc: Matthew Wilcox <willy@infradead.org> Cc: Michal Hocko <mhocko@suse.com> Cc: Oleksiy Avramchenko <oleksiy.avramchenko@sonymobile.com> Cc: Thomas Gleixner <tglx@linutronix.de> Signed-off-by:
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Uladzislau Rezki (Sony) authored
This adds a new kernel module for analysis of vmalloc allocator. It is only enabled as a module. There are two main reasons this module should be used for: performance evaluation and stressing of vmalloc subsystem. It consists of several test cases. As of now there are 8. The module has five parameters we can specify to change its the behaviour. 1) run_test_mask - set of tests to be run id: 1, name: fix_size_alloc_test id: 2, name: full_fit_alloc_test id: 4, name: long_busy_list_alloc_test id: 8, name: random_size_alloc_test id: 16, name: fix_align_alloc_test id: 32, name: random_size_align_alloc_test id: 64, name: align_shift_alloc_test id: 128, name: pcpu_alloc_test By default all tests are in run test mask. If you want to select some specific tests it is possible to pass the mask. For example for first, second and fourth tests we go 11 value. 2) test_repeat_count - how many times each test should be repeated By default it is one time per test. It is possible to pass any number. As high the value is the test duration gets increased. 3) test_loop_count - internal test loop counter. By default it is set to 1000000. 4) single_cpu_test - use one CPU to run the tests By default this parameter is set to false. It means that all online CPUs execute tests. By setting it to 1, the tests are executed by first online CPU only. 5) sequential_test_order - run tests in sequential order By default this parameter is set to false. It means that before running tests the order is shuffled. It is possible to make it sequential, just set it to 1. Performance analysis: In order to evaluate performance of vmalloc allocations, usually it makes sense to use only one CPU that runs tests, use sequential order, number of repeat tests can be different as well as set of test mask. For example if we want to run all tests, to use one CPU and repeat each test 3 times. Insert the module passing following parameters: single_cpu_test=1 sequential_test_order=1 test_repeat_count=3 with following output: <snip> Summary: fix_size_alloc_test passed: 3 failed: 0 repeat: 3 loops: 1000000 avg: 901177 usec Summary: full_fit_alloc_test passed: 3 failed: 0 repeat: 3 loops: 1000000 avg: 1039341 usec Summary: long_busy_list_alloc_test passed: 3 failed: 0 repeat: 3 loops: 1000000 avg: 11775763 usec Summary: random_size_alloc_test passed 3: failed: 0 repeat: 3 loops: 1000000 avg: 6081992 usec Summary: fix_align_alloc_test passed: 3 failed: 0 repeat: 3, loops: 1000000 avg: 2003712 usec Summary: random_size_align_alloc_test passed: 3 failed: 0 repeat: 3 loops: 1000000 avg: 2895689 usec Summary: align_shift_alloc_test passed: 0 failed: 3 repeat: 3 loops: 1000000 avg: 573 usec Summary: pcpu_alloc_test passed: 3 failed: 0 repeat: 3 loops: 1000000 avg: 95802 usec All test took CPU0=192945605995 cycles <snip> The align_shift_alloc_test is expected to be failed. Stressing: In order to stress the vmalloc subsystem we run all available test cases on all available CPUs simultaneously. In order to prevent constant behaviour pattern, the test cases array is shuffled by default to randomize the order of test execution. For example if we want to run all tests(default), use all online CPUs(default) with shuffled order(default) and to repeat each test 30 times. The command would be like: modprobe vmalloc_test test_repeat_count=30 Expected results are the system is alive, there are no any BUG_ONs or Kernel Panics the tests are completed, no memory leaks. [urezki@gmail.com: fix 32-bit builds] Link: http://lkml.kernel.org/r/20190106214839.ffvjvmrn52uqog7k@pc636 [urezki@gmail.com: make CONFIG_TEST_VMALLOC depend on CONFIG_MMU] Link: http://lkml.kernel.org/r/20190219085441.s6bg2gpy4esny5vw@pc636 Link: http://lkml.kernel.org/r/20190103142108.20744-3-urezki@gmail.comSigned-off-by:
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Uladzislau Rezki (Sony) authored
Export __vmaloc_node_range() function if CONFIG_TEST_VMALLOC_MODULE is enabled. Some test cases in vmalloc test suite module require and make use of that function. Please note, that it is not supposed to be used for other purposes. We need it only for performance analysis, stressing and stability check of vmalloc allocator. Link: http://lkml.kernel.org/r/20190103142108.20744-2-urezki@gmail.comSigned-off-by:
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Roman Penyaev authored
vmalloc_user*() calls differ from normal vmalloc() only in that they set VM_USERMAP flags for the area. During the whole history of vmalloc.c changes now it is possible simply to pass VM_USERMAP flags directly to __vmalloc_node_range() call instead of finding the area (which obviously takes time) after the allocation. Link: http://lkml.kernel.org/r/20190103145954.16942-4-rpenyaev@suse.deSigned-off-by:
Roman Penyaev <rpenyaev@suse.de> Acked-by:
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Roman Penyaev authored
__vmalloc_area_node() calls vfree() on error path, which in turn calls kmemleak_free(), but area is not yet accounted by kmemleak_vmalloc(). Link: http://lkml.kernel.org/r/20190103145954.16942-3-rpenyaev@suse.deSigned-off-by:
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Roman Penyaev authored
When VM_NO_GUARD is not set area->size includes adjacent guard page, thus for correct size checking get_vm_area_size() should be used, but not area->size. This fixes possible kernel oops when userspace tries to mmap an area on 1 page bigger than was allocated by vmalloc_user() call: the size check inside remap_vmalloc_range_partial() accounts non-existing guard page also, so check successfully passes but vmalloc_to_page() returns NULL (guard page does not physically exist). The following code pattern example should trigger an oops: static int oops_mmap(struct file *file, struct vm_area_struct *vma) { void *mem; mem = vmalloc_user(4096); BUG_ON(!mem); /* Do not care about mem leak */ return remap_vmalloc_range(vma, mem, 0); } And userspace simply mmaps size + PAGE_SIZE: mmap(NULL, 8192, PROT_WRITE|PROT_READ, MAP_PRIVATE, fd, 0); Possible candidates for oops which do not have any explicit size checks: *** drivers/media/usb/stkwebcam/stk-webcam.c: v4l_stk_mmap[789] ret = remap_vmalloc_range(vma, sbuf->buffer, 0); Or the following one: *** drivers/video/fbdev/core/fbmem.c static int fb_mmap(struct file *file, struct vm_area_struct * vma) ... res = fb->fb_mmap(info, vma); Where fb_mmap callback calls remap_vmalloc_range() directly without any explicit checks: *** drivers/video/fbdev/vfb.c static int vfb_mmap(struct fb_info *info, struct vm_area_struct *vma) { return remap_vmalloc_range(vma, (void *)info->fix.smem_start, vma->vm_pgoff); } Link: http://lkml.kernel.org/r/20190103145954.16942-2-rpenyaev@suse.deSigned-off-by: -
Roman Penyaev authored
This patch repeats the original one from David S Miller: 2dca6999 ("mm, perf_event: Make vmalloc_user() align base kernel virtual address to SHMLBA") but for missed vmalloc_32_user() case, which also requires correct alignment of virtual address on kernel side to avoid D-caches aliases. A bit of copy-paste from original patch to recover in memory of what is all about: When a vmalloc'd area is mmap'd into userspace, some kind of co-ordination is necessary for this to work on platforms with cpu D-caches which can have aliases. Otherwise kernel side writes won't be seen properly in userspace and vice versa. If the kernel side mapping and the user side one have the same alignment, modulo SHMLBA, this can work as long as VM_SHARED is shared of VMA and for all current users this is true. VM_SHARED will force SHMLBA alignment of the user side mmap on platforms with D-cache aliasing matters. David S. Miller > What are the user-visible runtime effects of this change? In simple words: proper alignment avoids possible difference in data, seen by different virtual mapings: userspace and kernel in our case. I.e. userspace reads cache line A, kernel writes to cache line B. Both cache lines correspond to the same physical memory (thus aliases). So this should fix data corruption for archs with vivt and vipt caches, e.g. armv6. Personally I've never worked with this archs, I just spotted the strange difference in code: for one case we do alignment, for another - not. I have a strong feeling that David simply missed vmalloc_32_user() case. > > Is a -stable backport needed? No, I do not think so. The only one user of vmalloc_32_user() is virtual frame buffer device drivers/video/fbdev/vfb.c, which has in the description "The main use of this frame buffer device is testing and debugging the frame buffer subsystem. Do NOT enable it for normal systems!". And it seems to me that this vfb.c does not need 32bit addressable pages (vmalloc_32_user() case), because it is virtual device and should not care about things like dma32 zones, etc. Probably is better to clean the code and switch vfb.c from vmalloc_32_user() to vmalloc_user() case and wipe out vmalloc_32_user() from vmalloc.c completely. But I'm not very much sure that this is worth to do, that's so minor, so we can leave it as is. Link: http://lkml.kernel.org/r/20190108110944.23591-1-rpenyaev@suse.deSigned-off-by:
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Shakeel Butt authored
Move the memcg_kmem_enabled() checks into memcg kmem charge/uncharge functions, so, the users don't have to explicitly check that condition. This is purely code cleanup patch without any functional change. Only the order of checks in memcg_charge_slab() can potentially be changed but the functionally it will be same. This should not matter as memcg_charge_slab() is not in the hot path. Link: http://lkml.kernel.org/r/20190103161203.162375-1-shakeelb@google.comSigned-off-by:
Shakeel Butt <shakeelb@google.com> Acked-by:
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