Lc Optimize

LuisaCompute DSL Kernel Optimization Guide

Zero-initialization note: All temporary local variables in DSL kernels — scalars, vectors, matrices, structs, and arrays (excluding shared arrays Shared<T>) — are created with a zero value automatically. There is no need to manually set them to zero before use. This applies to variables declared with Var<T>, auto, or type-inferred syntax inside a kernel or callable body.

1. Available Warp/Wave Primitives

LuisaCompute exposes the following warp-level (subgroup) intrinsics via luisa/dsl/builtin.h. All operate on active lanes within the current warp.

1.1 Query / Metadata

1.2 Active-Lane Reductions (All-Reduce)

Each lane receives the same reduced value.

All accept scalar or vector types (except bit ops which require integral types).

1.3 Prefix (Exclusive Scan)

Each lane receives the exclusive prefix of all preceding active lanes. Lane 0 receives identity (0 for sum, 1 for product, 0u for count_bits).

1.4 Lane Communication (Shuffle)

1.5 Configuration

Critical rule: Warp operations only communicate within the same warp. No sync_block() is needed for warp collectives — they are guaranteed to complete within the warp without barriers.

2. Usage Patterns (Project Analysis)

2.1 Warp-Level Matrix Multiplication

Pattern: each warp computes one output tile via warp_active_sum reduction over the K dimension.

auto warp_size = device.compute_warp_size();
Kernel2D mat_mul = [&](BufferFloat lhs, BufferFloat rhs, BufferFloat result, UInt lhs_row_size) {
    set_block_size(128, 1, 1);
    set_warp_size(warp_size);

    UInt lhs_y = dispatch_id().x / warp_size;
    UInt rhs_x = dispatch_id().y;
    UInt warp_lane = warp_lane_id();

    UInt tile_count = (lhs_row_size + warp_size - 1) / warp_size;
    Float acc = 0.f;

    for (auto t : dynamic_range(tile_count)) {
        UInt lhs_x = t * warp_size + warp_lane;
        Float local_v;
        $if (lhs_x < lhs_row_size) {
            local_v = lhs.read(lhs_y * lhs_row_size + lhs_x)
                    * rhs.read(rhs_x * lhs_row_size + lhs_x);
        } $else {
            local_v = 0.f;
        };
        acc += warp_active_sum(local_v);   // all-reduce sum within warp
    }

    $if (warp_lane == 0) {
        result.write(rhs_x * /*M*/ ...  + lhs_y, acc);
    };
};

Key insight: Warp-active reductions eliminate the need for shared memory entirely. All lanes in a warp already execute in lockstep, so warp_active_sum is a single hardware instruction on most GPUs.

2.2 Butterfly Reduction via warp_read_lane

For finding the maximum across a logical group smaller than the warp, use pairwise warp_read_lane with XOR lane masks (butterfly / tree-reduction pattern):

// 8-lane max reduction within a group of 8
Float m = input;
m = max(m, warp_read_lane(m, lane ^ 4u));  // distance 4
m = max(m, warp_read_lane(m, lane ^ 2u));  // distance 2
m = max(m, warp_read_lane(m, lane ^ 1u));  // distance 1
// Now lane 0..7 all have the max of lanes 0..7 (modulo diverged lanes)

This is used for the softmax normalization constant. Each logical group of 8 lanes computes its own max independently, without a barrier.

2.3 Grouped Prefix + Inter-Group Read

When a warp contains multiple independent logical groups, compute the inclusive prefix sum per group, then use warp_read_lane to fetch the last element of the previous group:

constexpr uint kWarpSize = 32u;
constexpr uint kGroupLanes = 8u;
constexpr uint kGroupsPerWarp = kWarpSize / kGroupLanes;  // 4

auto lane = warp_lane_id();
auto group_id = lane / kGroupLanes;      // which group (0..3)
auto group_lane = lane % kGroupLanes;    // position within group (0..7)

auto prefix = warp_prefix_sum(value);    // exclusive prefix across whole warp
auto inclusive = prefix + value;

// Last lane of this group
auto last_lane = group_id * kGroupLanes + (kGroupLanes - 1u);
auto incl_last = warp_read_lane(inclusive, last_lane);

// Last lane of previous group (or 0 for group 0)
auto prev_last = ite(group_id == 0u, 0u, last_lane - kGroupLanes);
auto prev_incl = warp_read_lane(inclusive, prev_last);

auto group_sum = incl_last - ite(group_id == 0u, make_float2(0.f), prev_incl);

This avoids separate warp_prefix_sum calls per group and instead uses a single warp-wide prefix plus lane reads to extract group boundaries.

2.4 Warp-Polling Decoupled Look-Back

For inter-block scan, tiles publish their status and other tiles poll via warp collectives:

// Poll across warp: any lane sees INVALID?
$while (warp_active_any(status == SCAN_TILE_INVALID)) {
    delay();
    status = tile_status.volatile_read(predecessor_idx);
};

// All lanes agree predecessor is inclusive?
$while (warp_active_all(predecessor_status != SCAN_TILE_INCLUSIVE)) {
    predecessor_idx -= 32;
    // poll next window...
    exclusive = scan_op(window_aggregate, exclusive);
};

Also uses warp_active_bit_mask for segmented reductions within warps:

UInt warp_flags = warp_active_bit_mask(flag == 1u).x;
warp_flags >>= 1;  // for HEAD_SEGMENT mode
warp_flags &= get_lane_mask_ge();  // mask of lanes with id >= mine
warp_flags |= 1u << (LOGIC_WARP_SIZE - 1u);  // sentinel
UInt last_lane = ctz(warp_flags);  // first set bit = end of my segment

2.5 Shuffle-Down for Warp Reduction

A software implementation of warp reduce using warp_read_lane with increasing offsets:

Var<T> result = input;
UInt offset = 1u;
$while (offset < warp_lane_count()) {
    Var<T> temp = warp_read_lane(result, lane_id + offset, valid_item);
    $if (lane_id + offset <= valid_item) {
        result = reduce_op(result, temp);
    };
    offset <<= 1;
};

This is a fallback pattern; prefer warp_active_sum / warp_active_min / warp_active_max when the operation matches the built-in.

2.6 Quantized Matmul with Warp

Warp-level GEMM where each warp computes one output tile. Threads cooperatively load quantized weights via warp_read_lane to assemble dequantized values, then accumulate with warp_active_sum:

auto warp_lane = warp_lane_id();
UInt tile_count = (K + warp_size - 1) / warp_size;
for (auto t : dynamic_range(tile_count)) {
    UInt tile_begin = t * warp_size;
    UInt tile_size = min(warp_size, K - tile_begin);

    // Each lane loads one quantized word, then shares via warp_read_lane
    UInt rel_byte = warp_lane * kElementByteSize;
    UInt word = warp_read_lane(warp_word, rel_byte / 4u);
    // ... dequantize and multiply ...

    acc += warp_active_sum(local_v);
}

3. Optimization Transformations

3.1 Shared-Memory Atomic → Warp Collective

Before: Block-level atomic on shared memory.

Shared<int> shared{1u};
shared[0u] = 0;
sync_block();
shared.atomic(0u).fetch_add(1);  // contended within block
sync_block();
$if (thread_x() == 0u) {
    global_counter.atomic(0u).fetch_add(shared.read(0u));
};

After: Use warp_active_sum per warp, then one lane writes.

// Each warp computes its own partial sum
Int warp_partial = warp_active_sum(1);
// First lane of each warp writes to shared
$if (warp_is_first_active_lane()) {
    shared.atomic(warp_lane_id() / warp_size).fetch_add(warp_partial);
};
sync_block();
// One thread (e.g. thread 0) combines across warps
$if (thread_x() == 0u) {
    Int block_total = 0;
    for (auto w : range(num_warps_per_block)) {
        block_total += shared.read(w);
    };
    global_counter.atomic(0u).fetch_add(block_total);
};

3.2 Shared-Memory Reduction → Warp Reduction

Before: Entire block reduces into shared memory.

Shared<float> smem{block_size};
smem[tid] = value;
sync_block();
for (uint stride = block_size / 2; stride > 0; stride >>= 1) {
    $if (tid < stride) {
        smem[tid] += smem[tid + stride];
    };
    sync_block();
};

After: Warp-level reduction + cross-warp shared reduction.

// Phase 1: warp-level reduction (no shared memory, no barrier)
Float warp_sum = warp_active_sum(value);

// Phase 2: cross-warp reduction in shared memory (much smaller)
$if (warp_is_first_active_lane()) {
    Shared<float> warp_results{num_warps_per_block};
    warp_results[warp_id()] = warp_sum;
};
sync_block();
// Only num_warps_per_block threads participate in phase 2
$if (thread_x() < num_warps_per_block) {
    Float v = warp_results[thread_x()];
    Float warp_partial = warp_active_sum(v);  // second warp reduce
    $if (warp_is_first_active_lane()) {
        result = warp_partial;
    };
};

3.3 Pairwise Max/Min → Built-in Warp Max/Min

Before: Butterfly pattern with warp_read_lane.

Float m = value;
m = max(m, warp_read_lane(m, lane ^ 4u));
m = max(m, warp_read_lane(m, lane ^ 2u));
m = max(m, warp_read_lane(m, lane ^ 1u));

After: Single warp_active_max when reduction spans the whole warp.

Float m = warp_active_max(value);

When to keep butterfly: Only when reducing over a logical group smaller than the warp (e.g. 8-lane groups inside a 32-lane warp). In that case warp_active_max would reduce over all 32 lanes, which is incorrect.

3.4 Sequential Lane Reads → warp_prefix_sum

Before: Manually accumulating values from lower lanes via a loop of warp_read_lane.

Float prefix = 0.f;
for (uint i = 0; i < warp_lane_id(); i++) {
    prefix += warp_read_lane(value, i);
};

After: Single warp_prefix_sum call.

Float prefix = warp_prefix_sum(value);

3.5 Conditional Participation

When only a subset of lanes should participate in a warp collective, wrap the call in a conditional. Lanes that don't execute the call are excluded from the reduction/scan:

$if (thread_x() % 2u == 0u) {
    // Only even-index threads contribute
    auto result = warp_prefix_sum(make_half4(.5_h));
    device_log("{} -> {}", dispatch_x(), result);
};
// Odd threads don't participate; they receive no result.

This pattern is commonly used for partial-warp scans where only a subset of lanes needs results.

3.6 Ballot + Count Bits for Control Flow

Use warp_active_bit_mask to build a lane mask, then ctz / popcount to locate lanes or count participants:

UInt4 mask = warp_active_bit_mask(condition);
UInt flag_mask = mask.x;  // first 32 lanes
UInt first_true = ctz(flag_mask);
UInt num_true = popcount(flag_mask);

4. Shared Array (Workgroup Memory) Optimization

Warp collectives (section 3) only communicate within one warp. When cooperation must span the whole thread block (multiple warps), or you need persistent per-block scratch, arbitrary cross-thread indexing, or block-local privatization of a global atomic, use a shared array (Shared<T> / $shared<T>). Shared memory is on-chip and orders of magnitude faster than global memory, so staging data there once and reusing it, or aggregating locally before touching global memory, is a core optimization.

4.1 API (include/luisa/dsl/shared.h, include/luisa/dsl/sugar.h:105)

Always set_block_size(...) and size the array to the block (Shared<T> s{block_size}). Use sync_block() to make writes visible across warps.

4.2 When to prefer shared memory over warp collectives

4.3 Block-Local Atomic Privatization → One Global Atomic

The biggest shared-memory win: replace up to block_size contended global atomics with per-thread shared atomics plus a single global atomic per block. Pattern from test_atomic_queue.cpp (push_if) and test_shared_memory.cpp (AtomicQueue::push):

// Append `value` to a global queue when `pred` holds, minimizing global contention.
Shared<uint> index{1};
$if (thread_x() == 0u) { index.write(0u, 0u); };   // init block counter
sync_block();

auto local_index = def(0u);
$if (pred) { local_index = index.atomic(0).fetch_add(1u); };  // cheap SHARED atomic
sync_block();

$if (thread_x() == 0u) {                            // ONE global atomic for the whole block
    auto local_count   = index.read(0u);
    auto global_offset = _counter->atomic(0u).fetch_add(local_count);
    index.write(0u, global_offset);                 // reuse slot to broadcast the base
};
sync_block();

$if (pred) {                                        // scatter to reserved, contiguous range
    auto global_index = index.read(0u) + local_index;
    _buffer->write(global_index, value);
};

Insight: Global-atomic traffic drops from O(active threads) to O(1) per block. Contention moves from device-wide global memory to fast on-chip shared memory. This is the standard stream-compaction / queue-append optimization.

4.4 Block-Wide Tree Reduction in Shared Memory

When the reduction spans the whole block, stage each thread's value in shared memory and reduce pairwise with a halving loop. Pattern from test_softmax.cpp (block sum for softmax) and test_complex_kernel.cpp:

set_block_size(block_size, 1, 1);          // power of two
Shared<float> shared_arr(block_size);       // one slot per thread
auto tid = thread_id().x;
shared_arr[tid] = value;                     // stage per-thread value

UInt half = block_size / 2u;
sync_block();
$while (half > 0u) {
    $if (tid < half) {                       // compute into a register FIRST
        value = shared_arr[tid * 2] + shared_arr[tid * 2 + 1];
    };
    sync_block();                            // barrier between read and write-back
    $if (tid < half) {
        shared_arr[tid] = value;             // write reduced value back
    };
    half /= 2u;
    sync_block();                            // barrier before next iteration's reads
};
$if (tid == 0u) { output.write(block_id().x, shared_arr[0]); };  // thread 0 emits block result

Why two sync_block() per step: reducing into a local value register and only writing back after a barrier avoids the read-after-write / write-after-read hazard where one thread overwrites a slot another thread is still reading. Prefer this whole-block form only when block_size > warp_size; inside a single warp, warp_active_sum (section 3.2) is faster and barrier-free.

4.5 Two-Level Reduction: Warp Collective → Shared → Block

Combine both tools: reduce within each warp with a warp collective (no barrier), write one partial per warp to a small shared array, then reduce those partials. This minimizes both shared traffic and barriers vs. a full block tree reduction (see also sections 3.1/3.2):

UInt warp_id = thread_x() / warp_size;            // which warp in the block (warp_size = device.compute_warp_size())
Float warp_sum = warp_active_sum(value);          // phase 1: intra-warp, no barrier
Shared<float> warp_results{num_warps_per_block};
$if (warp_is_first_active_lane()) {
    warp_results[warp_id] = warp_sum;             // one write per warp
};
sync_block();
$if (thread_x() < num_warps_per_block) {          // phase 2: reduce the few partials
    Float block_sum = warp_active_sum(warp_results[thread_x()]);
    $if (warp_is_first_active_lane()) { /* thread 0 has the block total */ };
};

4.6 Shared as Staging / Scratch for Reuse & Exchange

Load global data into shared once, then reuse it many times or exchange it between threads, avoiding repeated global reads. Patterns from test_shared_mem.cpp, test_async_copy.cpp, and hierarchical mip reduction in test_mipmap.cpp:

set_block_size(N, 1u, 1u);
Shared<uint> s_src{N};
auto tid = thread_x();
s_src[tid] = src_buf.read(dispatch_x());     // global -> shared, once
sync_block();                                 // publish to the whole block
// ... now reuse s_src[...] / read neighbors' values without touching global memory ...

test_async_copy.cpp fills a shared staging buffer with async_copy(...) (thread 0 issues the copy, then sync_block() before consumers read). test_mipmap.cpp writes 2×2 block averages into Shared<float3> and reduces level-by-level with a sync_block() between levels.

4.7 Correctness & Performance Rules

1. Construct inside the kernel body. Shared<T> needs FunctionBuilder::current(); declaring it outside a kernel/callable is invalid.
2. Barrier discipline. A sync_block() is required (a) after initializing/filling shared before other threads read, and (b) between the read and write-back phases of each reduction step. Unlike warp collectives, shared memory is NOT self-synchronizing across warps.
3. Size to the block. Match the array length to set_block_size(...); use a power-of-two block for the halving tree reduction, and pad out-of-range lanes with the reduction identity (e.g. 0.f for sum) — see the $if (id < size) {...} $else { value = 0.f; } guards in test_softmax.cpp.
4. Register-then-write. In tree reductions, compute into a Var/register and write back only after a barrier to avoid RAW/WAR hazards.
5. Move-only ownership. Shared<T> cannot be copied; store Shared<T> * (via new) when a helper class must hold shared scratch.
6. Prefer warp collectives when they suffice. Shared memory costs a barrier and on-chip capacity; only reach for it when cooperation exceeds one warp or needs privatization/staging/arbitrary indexing.

5. Hardware Mapping

Always query device.compute_warp_size() on the host and warp_lane_count() on the device rather than hardcoding 32.

6. Rules of Thumb

1. Prefer warp collectives over shared memory. warp_active_sum, warp_active_max, warp_prefix_sum compile to single hardware instructions (e.g. __shfl_xor_sync on CUDA, OpGroupNonUniformFAdd on SPIR-V). No barrier needed.

2. Set warp size explicitly when using warp collectives: set_warp_size(device.compute_warp_size()) inside the kernel lambda.

3. Don't mix warp and block assumptions. warp_active_sum only reduces within the current warp. If you have multiple warps per block, use a two-level reduction (warp → shared → block).

4. sync_block() is NOT needed between warp collectives within the same warp. Warp ops are guaranteed complete for the calling lane immediately.

5. Divergence matters. Lanes that don't execute the warp collective call are excluded. Use this for conditional participation (section 3.5).

6. warp_prefix_sum is exclusive (not inclusive). Lane 0 always gets 0 (for sum) or 1 (for product).

7. Vector types work. All warp collectives accept float2, float3, float4, int2, etc. The operation applies component-wise.

8. Logic warp size. You can logically group lanes (e.g. 4 groups of 8 within a 32-lane warp) using lane % kGroupLanes and lane / kGroupLanes arithmetic. Use warp_read_lane to communicate across groups.

9. Use shared memory for block-wide cooperation (section 4). When cooperation exceeds one warp, or you need privatization/staging/arbitrary cross-thread indexing, Shared<T> beats warp collectives. Always set_block_size and size the array to the block.

10. Privatize global atomics into shared memory (section 4.3). Aggregate per-thread contributions with cheap shared atomics, then issue one global atomic per block. This is the key stream-compaction / queue-append win.

11. Shared memory needs sync_block(); warp collectives do not. Barrier after filling shared and between the read/write-back phases of a tree reduction (section 4.4). Reduce into a register first, then write back after the barrier to avoid RAW/WAR hazards.

7. Host-Side Command Batching with CommandList

GPU kernel optimization (sections 1–6) focuses on what happens inside a single kernel dispatch. Equally important is how you submit work from the host: every stream << command call adds driver overhead. When a per-frame or per-iteration hot loop issues many small stream submissions (upload, dispatch A, dispatch B, download, ...), the accumulated driver cost can become a bottleneck, especially on D3D12 and Vulkan where command submission is not free.

7.1 The Pattern

CommandList lets you batch multiple commands into a single submission. Commands are recorded into a CommandList object, then committed to the stream in one shot:

CommandList cmdlist = CommandList::create();
cmdlist << upload_command
        << dispatch_a
        << dispatch_b
        << download_command;
stream << cmdlist.commit() << synchronize();

All commands execute in FIFO order on the GPU, exactly as if they were submitted individually — but with a single driver round-trip instead of many.

7.2 When to Use

• Hot loops: Rendering loops, training iterations, or per-frame update loops that submit several commands each iteration.
• Dependent pipeline stages: Commands with producer-consumer relationships (e.g., kernel A writes a buffer, kernel B reads it) that can be submitted together because GPU ordering guarantees correct sequencing.
• Upload → compute → download chains: Batched uploads followed by multiple kernels then final downloads, all in one commit.

7.3 When NOT to Use

• Interactive latency-sensitive paths: If a command produces results that need immediate host feedback (e.g., debug readbacks), avoid delaying it behind unrelated work.
• Cross-stream synchronization: Commands in different streams (COMPUTE vs GRAPHICS) must use events for ordering; a single CommandList cannot span multiple streams.
• Very long command sequences: Extremely large command lists may starve the GPU if they take too long to record; split into chunks if recording itself becomes a bottleneck.

7.4 General Recipe

1. Identify the hot loop — look for repeated stream << statements inside a loop or per-frame function.
2. Group dependent commands — all commands that form an in-order GPU pipeline (upload → kernel A → kernel B → download) belong in the same CommandList.
3. Create and fill — call CommandList::create() once at the start of the group, then append commands with <<.
4. Commit once — stream << cmdlist.commit() submits the batch; follow with a single synchronize() if host-readback is needed.
5. Verify correctness — ensure the sequence of operations inside the CommandList matches the dependency order (commands execute in FIFO order on the GPU).

7.5 Performance Impact

Batching N separate stream << cmd submissions into one CommandList reduces:

• Driver submission overhead: Each stream submission incurs a kernel transition / command-queue flush cost. With CommandList, that cost is paid once per batch.
• Host-device synchronization points: A single commit() + synchronize() replaces N pairs of stream << ... << synchronize().

In practice, replacing 5+ stream submissions per iteration with a single CommandList::create() → commit() can yield measurable wall-clock speedups in offline rendering or training-data export loops, where the CPU-side submission overhead is a meaningful fraction of the iteration time.

7.6 Comparison with Other Optimizations

CommandList batching is orthogonal to kernel-level optimizations. Apply both: optimize the kernel with warp/shared-memory techniques, then batch the host submissions for maximum throughput.

7.7 Key Rules

1. One CommandList, one commit, one sync. Create a single CommandList for a group of dependent commands, commit it once, and synchronize once rather than submitting each command separately.
2. FIFO ordering preserved. Commands execute in record order — no need for explicit barriers between kernel dispatches and buffer copies inside the same CommandList (GPU pipeline dependencies are handled automatically).
3. Don't reuse a committed CommandList. After commit() the list is consumed; create a fresh one for the next batch.
4. Prefer CommandList over chaining on stream <<. Batched submission is more efficient than long chains of stream << a << b << c << synchronize() because it reduces internal queue flushes.
5. Combine with kernel optimization. Host-side batching and kernel-level warp/shared-memory optimization are complementary — use both.

7.8 Async Callbacks — Replacing synchronize() with Non-Blocking Completion

CommandList provides two callback hooks that decouple host work from GPU execution:

// Runs AFTER all GPU commands in this CommandList finish.
cmdlist.add_callback([](auto &&... captured) noexcept {
    // GPU work is done — safe to read back buffers, write files, etc.
});

// Runs when the CommandList is committed/destructed, BEFORE GPU starts.
cmdlist.add_dtor_callback([](auto &&... captured) noexcept {
    // Host-side cleanup of resources no longer needed.
});

7.8.1 Understanding the Two Callbacks

Critical difference: add_dtor_callback runs before GPU execution begins — it is not a completion callback. Only add_callback guarantees GPU work is finished.

7.8.2 Avoiding synchronize() Stalls

Without callbacks, host→GPU data exchange typically looks like:

// Blocking pattern: host stalls until GPU finishes.
stream << cmdlist.commit() << synchronize();  // host waits here
process_results(host_buffer);                  // then processes

add_callback lets you flip this into a non-blocking, continuation-passing style:

// Non-blocking pattern: callback processes results when GPU is done.
cmdlist.add_callback([host_buffer = std::move(host_buf)]() noexcept {
    process_results(host_buffer);  // runs after GPU finishes
});
stream << cmdlist.commit();  // host returns immediately, no stall
// Host can begin preparing the next frame/iteration NOW...

This is most impactful when:

• The host has independent work (e.g., preparing the next config, loading assets, updating UI).
• The GPU work is long enough that blocking would waste host cycles.
• You process results per-iteration and can pipeline iterations (iteration N's callback runs while iteration N+1's GPU work is already in flight).

7.8.3 The Pipelined Iteration Pattern

The classic pattern for hiding latency: overlap GPU execution of iteration N+1 with host processing of iteration N's results.

// Host-side buffers must outlive the GPU work.
// Use double-buffering or shared ownership (e.g., shared_ptr).
for (int i = 0; i < num_iterations; i++) {
    auto host_buf = std::make_shared<std::vector<float>>(size);
    CommandList cmdlist = CommandList::create();

    // Record GPU commands (upload, dispatch, download into host_buf)
    cmdlist << upload << kernel.dispatch(...) << download(host_buf->data());

    // Install the completion callback — captures host_buf by shared_ptr
    cmdlist.add_callback([host_buf, i]() noexcept {
        // GPU done: safely read host_buf, write to disk, etc.
        save_result(*host_buf, i);
    });

    // Submit without blocking — host returns immediately
    stream << cmdlist.commit();
    // Host can prepare iteration i+1's work right away...
}
// Final sync: wait for the very last iteration to finish.
stream << synchronize();

With this pattern:

• No synchronize() per iteration — only one final sync at the very end.
• CPU and GPU overlap — iteration N's result processing runs concurrently with iteration N+1's GPU execution.
• Throughput improves by the cost of one synchronize() stall × (N−1) iterations.

7.8.4 Capturing Resources for Callbacks

Lambdas passed to add_callback / add_dtor_callback must own their captured resources because the callback outlives the CommandList object. Use:

// ✅ Shared ownership (recommended for buffers)
auto data = std::make_shared<std::vector<float>>(size);
cmdlist.add_callback([data]() noexcept { /* safe */ });

// ✅ Move semantics for unique resources
auto data = std::make_unique<std::vector<float>>(size);
cmdlist.add_callback([data = std::move(data)]() noexcept { /* safe */ });

// ❌ Capturing raw pointers or references to stack/local variables is UAF.
float *raw = ...;
cmdlist.add_callback([raw]() noexcept { /* DANGER: raw may be dangling */ });

add_dtor_callback has the same ownership rules, despite running earlier — it still fires after commit() returns, so stack variables captured by reference would be invalid.

7.8.5 When to Use Which

7.8.6 Key Rules

1. add_callback fires after GPU completion — it is the non-blocking replacement for synchronize().
2. add_dtor_callback fires before GPU starts — use only for host-side cleanup, never for reading back GPU results.
3. Always capture by value (shared_ptr, unique_ptr, or copy). Raw pointers and references to stack variables are dangling by the time the callback runs.
4. One final synchronize() is still needed at the end of a pipeline to ensure the last iteration's callbacks have fired before the program exits.
5. Callbacks execute on an internal worker thread — they should not throw, block on the GPU, or perform GPU API calls on the same stream.