GopherCon 2018 - Allocator Wrestling

Beyang Liu for the GopherCon Liveblog on August 28, 2018

Summary

A whirlwind tour of the Go memory allocator and garbage collector, with tools and tips on how to optimize.

The allocator and garbage collector are pretty ingenious!
Single allocations are fast but not free
The garbage collector can stop individual goroutines, even though STW pauses are very short
A combination of tools is essential to understand what’s going on: benchmark with GC off
use CPU profiler to find hot allocations
use memory profiler to understand allocation count/bytes
use execution tracer to understand GC pattern
use escape analyzer to understand why allocations happen

Eben Freeman (@_emfree_), an engineer at Honeycomb, talks about pitfalls and optimizations related to the memory allocator in Go.

Go is a managed-memory language, which means most of the time you don’t have to worry about manual memory management, because the runtime does a lot of work for you. However, dynamic memory allocation is not free, and a program’s allocation patterns can substantially affect its performance. The performance implications, however, are not obvious from language syntax. This talk covers techniques and tools that you can use to detect and address allocator bottlenecks.

A motivating example

The architecture of the storage / query service at Honeycomb:

The design/performance goals are:

subsecond / single-digit second query latency
hundreds of millions / billions of rows per query
flexible queries, on-the-fly schema changes

Using the techniques described in this talk, they were able to obtain speedups of up to 2.5x on some key benchmarks:

Outline of this talk

Allocator internals: How do the allocator and garbage collector work?
Tools: Tools for understanding allocation patterns
What can we change? Strategies for improving memory efficiency

Allocator internals

Memory layout

Depending on their lifetimes, objects are allocated either on the goroutine’s stack or on the heap. The Go compiler decides which objects go where, but the general rule is that objects that outlive their containing function calls need to go on the heap.

So what actually is in the heap? How did it get there? And who’s keeping track of it all?

To answer these questions, we should think about what design goals the authors of the heap memory allocator probably had in mind:

Goal: Efficiently satisfy allocations of a given size, but avoid fragmentation
- Solution: allocate like-sized objects in blocks
Goal: Avoid locking in the common case
- Solution: maintain per-CPU caches
Goal: Efficiently reclaim freeable memory
- Solution: use bitmaps for metadata, run GC concurrently ` The heap is divided into two levels of structure: arenas and spans:

A global mheap struct keeps track of both of them:

type mheap struct {
  arenas [1 << 22]*heapArena       // Covering map of arena frames
  free []mSpanList                 // Lists of fully free spans
  central []mcentral               // Lists of in-use spans
  // plus much more
}

Arenas are coarse sections of the available address space (64MB on 64-bit archs). We allocate OS memory in units of arenas. For each arena, there’s metadata in a heapArena struct:

type mheap struct {
  arenas [1 << 22]*heapArena    // Covering map of arena frames
  // ...
}

type heapArena struct {
   // page-granularity map to spans
  spans [pagesPerArena]*mspan
  // pointer/scalar bitmap (2bits/word)
  bitmap [heapArenaBitmapBytes]byte
}

Most heap objects live in a span: a run of pages containing objects of a fixed size class:

type span struct {
  startAddr  uintptr
  npages     uintptr
  spanclass  spanClass

  // allocated/free bitmap
  allocBits *gcBits
  // ...
}

There are ~70 different span size classes.

Each P has an mcache holding a span of each size class. Ideally, allocations can be satisfied directly out of the mcache (so they’re fast). In Go, a P is a scheduling context. Generally there’s one P per core and at most one goroutine running per P at a time:

To allocate, we find the first free object in our cached mspan, then return its address:

Let’s say we need 96 bytes. First we’d look in the mcache for the mspan with 96-byte objects. After allocation, the picture would look like this:

This design means that “most” memory allocations are fast and require no locking! There are just 3 quick steps:

Find a cached span with the right size (mcache.mspan[sizeClass])
Find the next free object in the span
If necessary, update the heap bitmap

So now we have covered 2 of our 3 design goals for the allocator: (1) Efficiently satisfy allocations of a given size, but avoid fragmentation, (2) Avoid locking in the common case. But what about (3) Efficiently reclaim memory? In other words, garbage collection?

Garbage collection

We have to find and reclaim objects once they’re no longer referenced.

Go uses a tricolor concurrent mark-sweep garbage collector, which sounds intimidating, but isn’t. “Mark-sweep” means the garbage collector is divided into a mark phase, where objects are marked for collection, and a sweep phase, where memory is actually freed.

In a tricolor garbage collector, objects are marked white, grey, or black. Initially, all objects are white. We start by marking goroutine stacks and globals. When we reach an object, we mark it grey:

When an object’s referents are all marked, we mark it black:

At the end, objects are either white or black:

White objects can then be swept and freed.

Simple, right? Well, it leaves some questions open:

How do we know what an object’s referents are?
How do we actually mark an object?

Go uses bitmaps for such metadata.

Pointer identification

Say we have a struct type like:

type Row struct {
  index int
  data []interface{}
}

In memory, that looks like:

How does the garbage collector know what other objects it points to? I.e., which of its fields are pointers?

Remember that this heap object is actually inside an arena. The arena’s bitmap tells us which of its words are pointers:

Mark state

Similarly, mark state is kept in a span’s gcMark bits:

Once we’re done marking, unmarked bits correspond to free slots, so we can just swap that mark state into the alloc bits:

This means sweeping in Go is generally super fast (while marking adds more overhead and is what we have to be concerned about).

The garbage collector is concurrent… with a twist. If we’re not careful with the implementation, the application can do sneaky stuff to thwart the garbage collector. For example, take the following code:

type S struct {
  p *int
}

func f(s *S) *int {
  r := s.p
  s.p = nil
  return r
}

After the first line of the function executes, we could end up with a state like this:

And at the return statement, the GC state could look like this:

And then the return value would be a live pointer to memory that the garbage collector could free!

To prevent this from occurring, the compiler translates pointer writes into potential calls into the write barrier. Very roughly:

There are many ingenious optimizations in the Go compiler that let this process happen concurrently, but we won’t get into those here.

We can, however, begin to understand how marking might be a problem as far as processor overhead is concerned.

When GC is marking, the write barrier is turned on.

During marking 25% of GOMAXPROCS are dedicated to background marking. But additional goroutines can be forced into mark assist:

Why the need for mark assist? A rapidly allocating goroutine can outrun the background markers. So when allocating during marking, a goroutine gets charged for each allocation. If it’s in debt, it has to do mark work before continuing:

func mallocgc(size uintptr, ...) unsafe.Pointer {
   // ...
   assistG.gcAssistBytes -= int64(size)
	if assistG.gcAssistBytes < 0 {
       // This goroutine is in debt. Assist the GC to
       // this before allocating. This must happen
       // before disabling preemption.
       gcAssistAlloc(assistG)
    }
    // ...

Summary

We’ve learned quite a bit about the runtime:

The runtime allocates data in spans to avoid fragmentation
Per-CPU caches speed up allocation, but the allocator still has to do some bookkeeping
GC is concurrent, but write barriers and mark assists can slow a program
GC work is proportional to scannable heap (allocating a big buffer of scalars is much cheaper than allocating a big buffer of pointers, because you have to follow the pointers)

Tools

It seems like dynamic memory allocation has some cost. Does this mean that reducing allocations will always improve performance? Well, it depends. The builtin memory profiler can tell us where we’re allocating, but can’t answer the causal question, “Will reducing allocations make a difference?” To do that, we can use three other tools:

crude experimenting
sampling profiling with pprof
go tool trace

Crude experimenting

If you want to see how much overhead the allocator and garbage collector add, you can turn them off with the following runtime flags:

GOGC=off : Disables garbage collector
GODEBUG=sbrk=1 : Replaces entire allocator with simple persistent allocator that gets big blocks from the OS and gives you successive slices of those as you allocate

This might seem kind of stupid, but it’s a cheap way to establish a rough estimate of possible speedup potential. Maybe 30% speedup isn’t worthwhile – or maybe it’s a compelling opportunity!

Problems with this approach:

not viable in production, need synthetic benchmarks
not reliable for programs with large heaps: persistent allocator may not perform that well either for those

However, it is a worthwhile first check.

Profiling

A pprof CPU profile can often show time spent in runtime.mallocgc.

Tips:

Use the flamegraph viewer in the pprof web UI
If pprof isn’t enabled in your binary, you can use Linux perf too

This gives us line-level attribution of where we’re doing CPU-expensive allocations, and can help clue us into the underlying cause of GC/allocator overhead.

Problems with this approach:

Program might not be CPU-bound
Allocation might not be on critical path
Time in background marking (gcBgMarkWorker) can mislead (time spent here doesn’t necessarily mean you have net slowdown)

go tool trace

The execution tracer might be the best tool at our disposal to understand the impact of allocating in granular detail.

The execution tracer captures very granular runtime events over a short time window:

curl localhost:6060/debug/pprof/trace?seconds=5 > trace.out

You can visualize the output in a web UI:

go tool trace trace.out

…though it can be a little dense:

The top-level blue bar shows you at a top-level when GC is running, and the lower bars show what’s happening internally.

Remember, top-level GC doesn’t mean the program is blocked, but what happens within GC is interesting!

The minimum mutator utilization curve can also show you if a service is GC-bound at different quartiles. (“Mutator” here means “not GC”.)

Summary

Together, benchmarks with the allocator off, CPU profiles, and execution traces give us a sense of:

whether allocation / GC are affecting performance
which call sites are spending a lot of time allocating
how throughput changes during GC.

What can we change?

If we’ve concluded that allocations are a source of inefficiency, what can we do? A few of high-level strategies:

Limit pointers
Allocate in batches
Try to recycle objects (e.g., sync.Pool)

What about just tuning GOGC?

Absolutely helps with throughput. However…
If we want to optimize for throughput, GOGC doesn’t express the real goal: “use all available memory, but no more”
Live heap size is generally but not always small
High GGOC makes avoiding OOMs harder

Okay, now onto things we can change in code to improve allocation/GC behavior…

Limit pointers

The Go compiler can be enticed to tell you why a variable is heap-allocated:

go build -gcflags="-m -m"

but its output is a bit unwieldy.

https://github.com/loov/view-annotated-file helps digest it:

Sometimes, spurious heap allocations are easily avoided!

In addition to avoiding spurious allocations, avoiding structs with inner pointers helps the garbage collector:

^ Why this discrepancy? Because the sneaky time.Time struct conceals a nefarious pointer:

type Time struct {
  wall uint64
  ext in64
  loc *Location
}

Slab allocation

Even though the fast path in the allocator is very optimized, we still need to do some work on every allocation:

prevent ourselves from being preempted
check if we need to assist GC
compute the next free slot in the mcache
set heap bitmap bits
etc.

That ends up being ~20ns per allocation, if you need a back-of-the-envelope. In some cases, we can amortize that overhead by doing fewer, bigger allocs:

// Allocate individual interface{}s out of a big buffer
type SlicePool struct {
	bigBuf []interface{}
}

func (s *SlicePool) GetSlice(size int) []interface{} {
	if size >= len(s.bigBuf) {
		s.bigBuf = make([]interface{}, blockSize)
	}
	res := s.bigBuf[:size]
	s.bigBuf = s.bigBuf[size:]
	return res
}

The danger is that any live reference will keep the whole slab alive:

Also, these aren’t safe for concurrent use. They’re best for a few heavily-allocating goroutines.

Recycling objects

Consider the following storage engine architecture:

This architecture

is simple, easy to reason about
maximizes available parallelism
generates tons of garbage

Optimization: explicitly recycle allocated blocks of memory:

var buf RowBuffer
select {
  case buf = <-recycled:
  default:
    buf = NewRowBuffer()
}

A more sophisticated version would use sync.Pool, which

maintains slices of recycled objects, sharded by CPU (with runtime support)
allows lock-free get/put in the fast path
caveat: cleared on every GC

Danger: must be very careful to zero or overwrite recycled memory.

In review

Below is a chart of different benchmarks after successive rounds of optimization (your mileage may vary):

In summary,

The allocator and garbage collector are pretty ingenious!
Single allocations are fast but not free
The garbage collector can stop individual goroutines, even though STW pauses are very short
A combination of tools is essential to understand what’s going on: benchmark with GC off
use CPU profiler to find hot allocations
use memory profiler to understand allocation count/bytes
use execution tracer to understand GC pattern
use escape analyzer to understand why allocations happen

Acknowledgements and further reading

Special credit to Ian Wilkes and many others at Honeycomb: the true masterminds

Jan	MAY	Aug
	11
2021	2022	2023

GopherCon and dotGo 2019 liveblogs

Summary

A motivating example

Outline of this talk

Allocator internals

Memory layout

Garbage collection

Pointer identification

Mark state

Summary

Tools

Crude experimenting

Profiling

go tool trace

Summary

What can we change?

What about just tuning GOGC?

Limit pointers

Slab allocation

Recycling objects

In review

Acknowledgements and further reading