On Tue, Feb 15, 2022 at 04:53:56PM -0500, Johannes Weiner wrote:
> Hi Yu,
>
> On Tue, Feb 15, 2022 at 02:43:05AM -0700, Yu Zhao wrote:
> > On Thu, Feb 10, 2022 at 03:41:57PM -0500, Johannes Weiner wrote:
> > > > +static inline bool lru_gen_is_active(struct lruvec *lruvec, int gen)
> > > > +{
> > > > + unsigned long max_seq = lruvec->lrugen.max_seq;
> > > > +
> > > > + VM_BUG_ON(gen >= MAX_NR_GENS);
> > > > +
> > > > + /* see the comment on MIN_NR_GENS */
> > > > + return gen == lru_gen_from_seq(max_seq) || gen == lru_gen_from_seq(max_seq - 1);
> > > > +}
> > >
> > > I'm still reading the series, so correct me if I'm wrong: the "active"
> > > set is split into two generations for the sole purpose of the
> > > second-chance policy for fresh faults, right?
> >
> > To be precise, the active/inactive notion on top of generations is
> > just for ABI compatibility, e.g., the counters in /proc/vmstat.
> > Otherwise, this function wouldn't be needed.
>
> Ah! would you mind adding this as a comment to the function?
Will do.
> But AFAICS there is the lru_gen_del_folio() callsite that maps it to
> the PG_active flag - which in turn gets used by add_folio() to place
> the thing back on the max_seq generation. So I suppose there is a
> secondary purpose of the function for remembering the page's rough age
> for non-reclaim isolation.>
Yes, e.g., migration.
> It would be good to capture that as well in a comment on the function.
Will do.
> > > > +static inline void lru_gen_update_size(struct lruvec *lruvec, enum lru_list lru,
> > > > + int zone, long delta)
> > > > +{
> > > > + struct pglist_data *pgdat = lruvec_pgdat(lruvec);
> > > > +
> > > > + lockdep_assert_held(&lruvec->lru_lock);
> > > > + WARN_ON_ONCE(delta != (int)delta);
> > > > +
> > > > + __mod_lruvec_state(lruvec, NR_LRU_BASE + lru, delta);
> > > > + __mod_zone_page_state(&pgdat->node_zones[zone], NR_ZONE_LRU_BASE + lru, delta);
> > > > +}
> > >
> > > This is a duplicate of update_lru_size(), please use that instead.
> > >
> > > Yeah technically you don't need the mem_cgroup_update_lru_size() but
> > > that's not worth sweating over, better to keep it simple.
> >
> > I agree we don't need the mem_cgroup_update_lru_size() -- let me spell
> > out why:
> > this function is not needed here because it updates the counters used
> > only by the active/inactive lru code, i.e., get_scan_count().
> >
> > However, we can't reuse update_lru_size() because MGLRU can trip the
> > WARN_ONCE() in mem_cgroup_update_lru_size().
> >
> > Unlike lru_zone_size[], lrugen->nr_pages[] is eventually consistent.
> > To move a page to a different generation, the gen counter in page->flags
> > is updated first, which doesn't require the LRU lock. The second step,
> > i.e., the update of lrugen->nr_pages[], requires the LRU lock, and it
> > usually isn't done immediately due to batching. Meanwhile, if this page
> > is, for example, isolated, nr_pages[] becomes temporarily unbalanced.
> > And this trips the WARN_ONCE().
>
> Good insight.
>
> But in that case, I'd still think it's better to use update_lru_size()
> and gate the memcg update on lrugen-enabled, with a short comment
> saying that lrugen has its own per-cgroup counts already. It's just a
> bit too error prone to duplicate the stat updates.
>
> Even better would be:
>
> static __always_inline
> void lruvec_add_folio(struct lruvec *lruvec, struct folio *folio)
> {
> enum lru_list lru = folio_lru_list(folio);
>
> update_lru_size(lruvec, lru, folio_zonenum(folio),
> folio_nr_pages(folio));
> if (lrugen_enabled(lruvec))
> lrugen_add_folio(lruvec, folio);
> else
> list_add(&folio->lru, &lruvec->lists[lru]);
> }
>
> But it does mean you'd have to handle unevictable pages. I'm reviewing
> from the position that mglru is going to supplant the existing reclaim
> algorithm in the long term, though, so being more comprehensive and
> eliminating special cases where possible is all-positive, IMO.
>
> Up to you. I'd only insist on reusing update_lru_size() at least.
Will do.
> > > > +static inline bool lru_gen_add_folio(struct lruvec *lruvec, struct folio *folio, bool reclaiming)
> > > > +{
> > > > + int gen;
> > > > + unsigned long old_flags, new_flags;
> > > > + int type = folio_is_file_lru(folio);
> > > > + int zone = folio_zonenum(folio);
> > > > + struct lru_gen_struct *lrugen = &lruvec->lrugen;
> > > > +
> > > > + if (folio_test_unevictable(folio) || !lrugen->enabled)
> > > > + return false;
> > >
> > > These two checks should be in the callsite and the function should
> > > return void. Otherwise you can't understand the callsite without
> > > drilling down into lrugen code, even if lrugen is disabled.
> >
> > I agree it's a bit of nuisance this way. The alternative is we'd need
> > ifdef or another helper at the call sites because lrugen->enabled is
> > specific to lrugen.
>
> Coming from memcg, my experience has been that when you have a compile
> time-optional MM extension like this, you'll sooner or later need a
> config-independent helper to gate callbacks in generic code. So I
> think it's a good idea to add one now.
>
> One of these?
>
> lruvec_on_lrugen()
SGTM.
Personally I'd reuse lru_gen_enabled(), by passing NULL/lruvec. But
my guess is you wouldn't like it.
> lruvec_using_lrugen()
> lruvec_lrugen_enabled()
>
> lruvec_has_generations() :-)
>
> > > On that note, I think #1 is reintroducing a problem we have fixed
> > > before, which is trashing the workingset with a flood of use-once
> > > mmapped pages. It's the classic scenario where LFU beats LRU.
> > >
> > > Mapped streaming IO isn't very common, but it does happen. See these
> > > commits:
> > >
> > > dfc8d636cdb95f7b792d5ba8c9f3b295809c125d
> > > 31c0569c3b0b6cc8a867ac6665ca081553f7984c
> > > 645747462435d84c6c6a64269ed49cc3015f753d
> > >
> > > From the changelog:
> > >
> > > The used-once mapped file page detection patchset.
> > >
> > > It is meant to help workloads with large amounts of shortly used file
> > > mappings, like rtorrent hashing a file or git when dealing with loose
> > > objects (git gc on a bigger site?).
> > >
> > > Right now, the VM activates referenced mapped file pages on first
> > > encounter on the inactive list and it takes a full memory cycle to
> > > reclaim them again. When those pages dominate memory, the system
> > > no longer has a meaningful notion of 'working set' and is required
> > > to give up the active list to make reclaim progress. Obviously,
> > > this results in rather bad scanning latencies and the wrong pages
> > > being reclaimed.
> > >
> > > This patch makes the VM be more careful about activating mapped file
> > > pages in the first place. The minimum granted lifetime without
> > > another memory access becomes an inactive list cycle instead of the
> > > full memory cycle, which is more natural given the mentioned loads.
> > >
> > > Translating this to multigen, it seems fresh faults should really
> > > start on the second oldest rather than on the youngest generation, to
> > > get a second chance but without jeopardizing the workingset if they
> > > don't take it.
> >
> > This is a good point, and I had worked on a similar idea but failed
> > to measure its benefits. In addition to placing mmapped file pages in
> > older generations, I also tried placing refaulted anon pages in older
> > generations. My conclusion was that the initial LRU positions of NFU
> > pages are not a bottleneck for workloads I've tested. The efficiency
> > of testing/clearing the accessed bit is.
>
> The concern isn't the scan overhead, but jankiness from the workingset
> being flooded out by streaming IO.
Yes, MGLRU uses a different approach to solve this problem, and for
its approach, the scan overhead is the concern.
MGLRU detects (defines) the working set by scanning the entire memory
for each generation, and it counters the flooding by accelerating the
creation of generations. IOW, all mapped pages have an equal chance to
get scanned, no matter which generation they are in. This is a design
difference compared with the active/inactive LRU, which tries to scans
the active/inactive lists less/more frequently.
> The concrete usecase at the time was a torrent client hashing a
> downloaded file and thereby kicking out the desktop environment, which
> caused jankiness. The hashing didn't benefit from caching - the file
> wouldn't have fit into RAM anyway - so this was pointless to boot.
>
> Essentially, the tradeoff is this:
>
> 1) If you treat new pages as hot, you accelerate workingset
> transitions, but on the flipside you risk unnecessary refaults in
> running applications when those new pages are one-off.
>
> 2) If you take new pages with a grain of salt, you protect existing
> applications better from one-off floods, but risk refaults in NEW
> application while they're trying to start up.
Agreed.
> There are two arguments for why 2) is preferable:
>
> 1) Users are tolerant of cache misses when applications first launch,
> much less so after they've been running for hours.
Our CUJs (Critical User Journeys) respectfully disagree :)
They are built on the observation that once users have moved onto
another tab/app, they are more likely to stay with the new tab/app
rather than go back to the old ones. Speaking for myself, this is
generally the case.
> 2) Workingset transitions (and associated jankiness) are bounded by
> the amount of RAM you need to repopulate. But streaming IO is
> bounded by storage, and datasets are routinely several times the
> amount of RAM. Uncacheable sets in excess of RAM can produce an
> infinite stream of "new" references; not protecting the workingset
> from that means longer or even sustained jankiness.
I'd argue the opposite -- we shouldn't risk refaulting fresh hot pages
just to accommodate this concrete yet minor use case, especially
considering torrent has been given the means (MADV_SEQUENTIAL) to help
itself.
I appreciate all your points here. The bottom line is we agree this is
a trade off. For what disagree about, we could be both right -- it
comes down to what workloads we care about *more*.
To move forward, I propose we look at it from a non-technical POV:
would we want to offer users an alternative trade off so that they can
have greater flexibility?
> > And some applications are smart enough to leverage MADV_SEQUENTIAL.
> > In this case, MGLRU does place mmapped file pages in the oldest
> > generation.
>
> Yes, it makes sense to optimize when MADV_SEQUENTIAL is requested. But
> that hint isn't reliably there, so it matters that we don't do poorly
> when it's missing.
Agreed.
> > I have an oversimplified script that uses memcached to mimic a
> > non-streaming workload and fio a (mmapped) streaming workload:
>
> Looking at the paramters and observed behavior, let me say up front
> that this looks like a useful benchmark, but doesn't capture the
> scenario I was talking about above.
>
> For one, the presence of swapping in both kernels suggests that the
> "streaming IO" component actually has repeat access that could benefit
> from caching. Second, I would expect memcache is accessing its memory
> frequently and consistently, and so could withstand workingset
> challenges from streaming IO better than, say, a desktop environment.
The fio workload is a real streaming workload, but the memcached
workload might have been too large to be a typical desktop workload.
More below.
> More on that below.
>
> > 1. With MADV_SEQUENTIAL, the non-streaming workload is about 5 times
> > faster when using MGLRU. Somehow the baseline (rc3) swapped a lot.
> > (It shouldn't, and I haven't figured out why.)
>
> Baseline swaps when there are cache refaults. This is regardless of
> the hint: you may say you're accessing these pages sequentially, but
> the refaults say you're reusing them, with a frequency that suggests
> they might be cacheable. So it tries to cache them.
>
> I'd be curious if that results in fio being faster, or whether it's
> all just pointless thrashing. Can you share the fio results too?
More below.
> We could patch baseline to prioritize MADV_SEQUENTIAL more, but...
>
> > 2. Without MADV_SEQUENTIAL, the non-streaming workload is about 1
> > time faster when using MGLRU. Both MGLRU and the baseline swapped
> > a lot.
>
> ...in practice I think this scenario will matter to a lot more users.
I strongly feel we should prioritize what's advertised on a man page
over an unspecified (performance) behavior.
> I would again be interested in the fio results.
>
> > MADV_SEQUENTIAL non-streaming ops/sec (memcached)
> > rc3 yes 292k
> > rc3 no 203k
> > rc3+v7 yes 1967k
> > rc3+v7 no 436k
> >
> > cat mmap.sh
> > modprobe brd rd_nr=2 rd_size=56623104
> >
> > mkswap /dev/ram0
> > swapon /dev/ram0
> >
> > mkfs.ext4 /dev/ram1
> > mount -t ext4 /dev/ram1 /mnt
> >
> > memtier_benchmark -S /var/run/memcached/memcached.sock -P memcache_binary \
> > -n allkeys --key-minimum=1 --key-maximum=50000000 --key-pattern=P:P -c 1 \
> > -t 36 --ratio 1:0 --pipeline 8 -d 2000
> >
> > # streaming workload: --fadvise_hint=0 disables MADV_SEQUENTIAL
> > fio -name=mglru --numjobs=12 --directory=/mnt --size=4224m --buffered=1 \
> > --ioengine=mmap --iodepth=128 --iodepth_batch_submit=32 \
> > --iodepth_batch_complete=32 --rw=read --time_based --ramp_time=10m \
> > --runtime=180m --group_reporting &
>
> As per above, I think this would be closer to a cacheable workingset
> than a streaming IO pattern. It depends on total RAM of course, but
> size=4G and time_based should loop around pretty quickly.
The file size here shouldn't matter since fio is smart enough to
invalidate page cache before it rewinds (for sequential access):
https://fio.readthedocs.io/en/latest/fio_doc.html#cmdoption-arg-invalidate
https://github.com/axboe/fio/blob/master/filesetup.c#L602
I think the problem might have been the memory size for memcached was
too large (100GB) to be all hot (limited by memory bandwidth).
> Would you mind rerunning with files larger than RAM, to avoid repeat
> accesses (or at least only repeat with large distances)?
Retested with the same free memory (120GB) for 40GB memcached and 200GB
fio.
MADV_SEQUENTIAL FADV_DONTNEED memcached fio
rc4 no yes 4716k 232k
rc4+v7 no yes 4307k 265k
delta -9% +14%
MGLRU lost with memcached but won with fio for the same reason: it
doesn't have any heuristics to detect the streaming characteristic
(and therefore lost with memcached) but relies on faster scanning
(and therefore won with fio) to keep the working set in memory.
The baseline didn't swap this time (MGLRU did slightly), but it lost
with fio because it had to walk the rmap for each page in the entire
200GB VMA, at least once, even for this streaming workload.
This reflects the design difference I mentioned earlier.
cat test.sh
modprobe brd rd_nr=1 rd_size=268435456
mkfs.ext4 /dev/ram0
mount -t ext4 /dev/ram0 /mnt
fallocate -l 40g /mnt/swapfile
mkswap /mnt/swapfile
swapon /mnt/swapfile
fio -name=mglru --numjobs=1 --directory=/mnt --size=204800m \
--buffered=1 --ioengine=mmap --fadvise_hint=0 --iodepth=128 \
--iodepth_batch_submit=32 --iodepth_batch_complete=32 \
--rw=read --time_based --ramp_time=10m --runtime=180m \
--group_reporting &
pid=$!
sleep 600
# load objects
memtier_benchmark -S /var/run/memcached/memcached.sock \
-P memcache_binary -n allkeys --key-minimum=1 \
--key-maximum=20000000 --key-pattern=P:P -c 1 -t 36 \
--ratio 1:0 --pipeline 8 -d 2000
# read objects
memtier_benchmark -S /var/run/memcached/memcached.sock \
-P memcache_binary -n allkeys --key-minimum=1 \
--key-maximum=20000000 --key-pattern=R:R -c 1 -t 36 \
--ratio 0:1 --pipeline 8 --randomize --distinct-client-seed
kill -INT $pid
> Depending on how hot memcache runs, it may or may not be able to hold
> onto its workingset.
Agreed.
> Testing interactivity is notoriously hard, but
> using a smaller, intermittent workload is probably more representative
> of overall responsiveness. Let fio ramp until memory is full, then do
> perf stat -r 10 /bin/sh -c 'git shortlog v5.0.. >/dev/null; sleep 1'
I'll also check with the downstream maintainers to see if they have
heard any complaints about streaming workloads negatively impacting
user experience.
> I'll try to reproduce this again too. Back then, that workload gave me
> a very janky desktop experience, and the patch very obvious relief.
SGTM.
> > > > @@ -113,6 +298,9 @@ void lruvec_add_folio_tail(struct lruvec *lruvec, struct folio *folio)
> > > > {
> > > > enum lru_list lru = folio_lru_list(folio);
> > > >
> > > > + if (lru_gen_add_folio(lruvec, folio, true))
> > > > + return;
> > > > +
> > >
> > > bool parameters are notoriously hard to follow in the callsite. Can
> > > you please add lru_gen_add_folio_tail() instead and have them use a
> > > common helper?
> >
> > I'm not sure -- there are several places like this one. My question is
> > whether we want to do it throughout this patchset. We'd end up with
> > many helpers and duplicate code. E.g., in this file alone, we have two
> > functions taking bool parameters:
> > lru_gen_add_folio(..., bool reclaiming)
> > lru_gen_del_folio(..., bool reclaiming)
> >
> > I can't say they are very readable; at least they are very compact
> > right now. My concern is that we might loose the latter without having
> > enough of the former.
> >
> > Perhaps this is something that we could revisit after you've finished
> > reviewing the entire patchset?
>
> Sure, fair enough.
>
> > > > +void lru_gen_init_state(struct mem_cgroup *memcg, struct lruvec *lruvec);
> > >
> > > "state" is what we usually init :) How about lrugen_init_lruvec()?
> >
> > Same story as "file", lol -- this used to be lru_gen_init_lruvec():
> > https://lore.kernel.org/linux-mm/20210413065633.2782273-9-yuzhao@xxxxxxxxxx/
> >
> > Naming is hard. Hopefully we can finalize it this time.
>
> Was that internal feedback? The revisions show this function went
> through several names, but I don't see reviews requesting those. If
> they weren't public I'm gonna pretend they didn't happen ;-)
Indeed. I lost track.
> > > You can drop the memcg parameter and use lruvec_memcg().
> >
> > lruvec_memcg() isn't available yet when pgdat_init_internals() calls
> > this function because mem_cgroup_disabled() is initialized afterward.
>
> Good catch. That'll container_of() into garbage. However, we have to
> assume that somebody's going to try that simplification again, so we
> should set up the code now to prevent issues.
>
> cgroup_disable parsing is self-contained, so we can pull it ahead in
> the init sequence. How about this?
>
> diff --git a/kernel/cgroup/cgroup.c b/kernel/cgroup/cgroup.c
> index 9d05c3ca2d5e..b544d768edc8 100644
> --- a/kernel/cgroup/cgroup.c
> +++ b/kernel/cgroup/cgroup.c
> @@ -6464,9 +6464,9 @@ static int __init cgroup_disable(char *str)
> break;
> }
> }
> - return 1;
> + return 0;
> }
> -__setup("cgroup_disable=", cgroup_disable);
> +early_param("cgroup_disable", cgroup_disable);
I think early_param() is still after pgdat_init_internals(), no?
Thanks!
