\section{The KernBench Platform}
\label{sec:platform}

All results in this report are produced on \emph{KernBench}, a
system-level discrete-event simulator for LLM kernels running on AHBM.
This section explains why the platform exists, how it executes a
kernel, how its latency model works---specifically how the hardware is
viewed as a graph, how that graph is driven by a discrete-event engine,
and how congestion is captured---and the concrete hardware configuration
used for every experiment that follows.

\subsection{Why KernBench: source-level kernels without a software stack}
\label{sec:why}

In a production end-to-end (E2E) stack, kernel performance is entangled
with every layer above the hardware: the compiler's tiling and
scheduling choices, the framework's operator dispatch, the collective
library, and the runtime. Good E2E numbers require \emph{all} of those
layers to be co-optimized, which makes it hard to answer a narrower but
more fundamental question: \emph{given the hardware, how fast can a
well-written kernel be, and which hardware features actually make it
faster?}

KernBench is built to answer exactly that question. Kernels are written
and executed at the \emph{source level}---as algorithmic descriptions
in a small tile-oriented kernel API---with no dependency on a compiler
or any other software-stack layer. The simulator takes the kernel and a
hardware topology and reports the latency the modeled hardware would
deliver. This isolation is deliberate: it lets us study algorithm-level
optimizations (how to tile a GEMM, how to schedule a collective, how to
fuse an attention kernel) and the hardware features that support them,
without the confound of compiler maturity or framework overhead. The
cost is that KernBench numbers are \emph{not} E2E latencies; they are
the achievable-kernel latencies an ideal software stack would expose.

\subsection{Execution model}
\label{sec:exec}

KernBench is layered along the flow of a request:

\begin{itemize}
  \item The \textbf{runtime API} is host-facing and
  topology-agnostic---it deploys tensors and launches kernels but knows
  nothing about routing or interconnect.
  \item The \textbf{simulation engine} schedules discrete events, routes
  every request through the modeled graph, and tracks completion via
  per-request correlation IDs.
  \item The \textbf{components} are device-side nodes that model
  hardware behavior: the per-PE blocks (scheduler, DMA, GEMM and
  vector-math engines, TCM, IPCQ), the NoC routers, the HBM
  controllers, and the inter-chiplet links.
\end{itemize}

Within a PE, work is expressed as \emph{composite commands}: a single
command carries an ordered pipeline of operations
(\textsf{DMA\_READ} $\rightarrow$ \textsf{FETCH} $\rightarrow$
\textsf{GEMM}/\textsf{MATH} $\rightarrow$ \textsf{STORE} $\rightarrow$
\textsf{DMA\_WRITE}) that the PE scheduler tiles and streams. This
composite mechanism is the substrate for the GEMM optimization
(\S\ref{sec:gemm}) and, combined with on-PE collectives, for fused
attention (\S\ref{sec:gqa}). Data and timing are handled in two passes,
so that a kernel's numeric results and its latency are computed
consistently but independently.

\subsection{Latency model: a graph traversed by events}
\label{sec:latency}

\paragraph{The hardware as a graph.} KernBench views the modeled
hardware as a directed graph. \emph{Nodes} are the components listed
above; \emph{edges} are the interconnect links between them, each
carrying bandwidth (\si{\giga\byte\per\second}) and propagation
(\si{\nano\second}) attributes. The topology is compiled once at
configuration time into this graph and is never mutated during a run.
Every routed request---a DMA, a remote read, an IPCQ message, a
kernel-launch command---is a \emph{traversal} of this graph from a
source node to a destination service, hopping through routers and
links along the way. There are no hidden shortcuts, implicit bypasses,
or magic paths: if a request reaches its destination, the path it took
is explicit in the graph, and the latency it incurred is the sum of
the per-node and per-edge costs paid along that path.

\paragraph{From graph to discrete-event simulation.} The graph is
driven by a discrete-event engine. Two kinds of events advance
simulation time: \emph{node events} (component switching overhead,
service completions such as an HBM channel commit or a GEMM tile
finish) and \emph{edge events} (the flit-by-flit serialization of a
payload across a bandwidth-limited link). The engine maintains a
priority queue of pending events ordered by their scheduled time,
fires them one at a time, and treats ties under a deterministic
ordering policy so that the same kernel on the same topology always
yields the same trace. Per-request correlation IDs are stamped at
injection and carried through every hop, so the trace is recoverable
from injection to completion. Every nanosecond in a reported latency
traces back to exactly one of these events on exactly one node or
edge.

\paragraph{Latency contributions.} Three kinds of latency accumulate
along a traversal: (i) \emph{per-node fixed overhead}---each component
carries a small switching cost (router decode, controller pickup,
scheduler handoff); (ii) \emph{per-edge transfer time}---each link's
payload is decomposed into fixed-size flits (default
\SI{256}{\byte}), and each flit arrives at
$\text{prop}+\text{flit\_bytes}/\text{bw}$ after the previous one,
giving wormhole semantics across multi-hop paths; and (iii)
\emph{per-service occupancy}---memory controllers, GEMM stages, and
collective engines hold the request for their service time before
releasing it downstream. Each of these is attached to a specific node
or edge in the graph; together they make up the entire latency budget.

\paragraph{Congestion: where bottlenecks emerge.} The simulator's
sharpness comes from how it models contention for those nodes and
edges. \emph{Every directed edge has a FIFO}: an arriving flit takes
its bandwidth-limited transfer time on top of whatever earlier flits
are still being served, so a busy link queues later traffic behind
earlier traffic rather than transferring everything at peak BW.
\emph{HBM is modeled with per-pseudo-channel parallelism}: a stateless
array of channel-availability timestamps with address-based channel
selection captures the bank-level concurrency that real HBM exposes,
so 64 channels per CUBE deliver real parallelism on uniform addresses
but a hot channel surfaces as the bottleneck on skewed ones.
\emph{Every component has a serial worker}: a router carrying two
heavy streams interleaves them at flit granularity in arrival order
rather than fanning out for free, so two concurrent collectives sharing
a link share its bandwidth, not double it. Without these mechanisms
the simulator would simply re-confirm the peak-BW roofline; with them,
it reveals where the real bottlenecks form and which hardware levers
actually relieve them---which is exactly the question the codesign
work in this report turns on.

\paragraph{Control-plane (issue) cost model.} The cost of \emph{issuing}
a command is modeled structurally rather than with a per-operation
calibration table. The PE control processor charges, per command,
\[
  d_{\text{cmd}} = \textsf{FIXED} + b_{\text{logical}} \cdot R,
\]
where $b_{\text{logical}}$ is the command's hardware-logical byte size,
\textsf{FIXED} captures the fixed per-command cost (queue-tail update,
completion registration) and $R$ captures the per-byte cost of
serializing the command descriptor into the scheduler queue. The
default anchoring (\textsf{FIXED} $= 40$ cycles, $R = 0.0625$
cycles/byte, i.e.\ \SI{16}{\byte\per\cycle}, at \SI{1}{\giga\hertz})
places a typical composite at roughly \SI{43}{\nano\second}, and a
hard cap on a composite's descriptor size prevents the model from
rewarding arbitrarily large fused commands beyond what real descriptor
queues accept. In the configurations measured here, command issue is
not the bottleneck---data movement is---so this term stays small
relative to DMA and collective time.

\paragraph{Accuracy.} The model is precise about the effects that
dominate kernel latency on this class of hardware: per-edge bandwidth
occupancy and flit-level serialization, HBM pseudo-channel parallelism,
and per-component switching overhead. Two independent cross-checks
drawn from the experiments in this report confirm that this precision
translates into physically reasonable kernel latencies. First, in the
GEMM study (\S\ref{sec:gemm}), simulator-measured MAC efficiency
tracks an analytic ideal-pipeline model within roughly
\SIrange{10}{20}{\percent} across a wide range of tile counts; the
residual gap is attributable to pipeline-fill and DMA effects the
analytic model omits. Second, in the all-reduce study
(\S\ref{sec:allreduce}, Fig.~\ref{fig:allreduce-cmp}), simulator
latency for a 2D-torus over six devices follows the expected
startup-plus-per-packet shape across the entire payload sweep---tight
at small payloads where startup dominates, and within a single-digit
multiplicative factor at the largest payloads, where the residual gap
is explained by per-router switching the analytic shape elides. A
single-device point from an external full-system simulator (FSIM) at
the largest payload sits an order of magnitude above the KernBench
multi-device torus, illustrating the well-known gap between an
achievable-kernel number and a full end-to-end-stack number rather
than a model error. The known simplifications---FIFO router
arbitration (instead of round-robin), HBM scheduler without
write-buffer reordering, no bank conflict, no refresh or thermal
effects, and no upstream backpressure---are the price of a
deterministic, inspectable model. They bound the absolute accuracy but
do not distort the \emph{relative} comparisons (tiling A vs.\ B,
topology X vs.\ Y, with vs.\ without composite command, mesh vs.\
torus) that this report is built on.

\subsection{Modeled hardware configuration}
\label{sec:hw}

Table~\ref{tab:hw} summarizes the hardware configuration used for
every experiment in this report. It is read directly from the
simulator's topology description; per-experiment workload parameters
(matrix shapes, collective sizes, sequence lengths) are stated in
their respective sections rather than here.

\begin{table}[t]
\centering
\caption{Modeled hardware configuration (shared by all experiments).}
\label{tab:hw}
\small
\begin{tabular}{@{}ll@{}}
\toprule
\textbf{Parameter} & \textbf{Value} \\
\midrule
\multicolumn{2}{@{}l}{\emph{Hierarchy}} \\
SIPs & 2 (1D ring) \\
CUBEs per SIP & 16 ($4\times4$ mesh) \\
PEs per CUBE & 8 (4 corners $\times$ 2) \\
PEs total & 256 \\
\midrule
\multicolumn{2}{@{}l}{\emph{Processing element (PE)}} \\
GEMM engine peak & \SI{8}{\tera\flop\per\second} (f16) \\
TCM (on-PE) & \SI{16}{\mega\byte}, \SI{512}{\giga\byte\per\second} R/W \\
\quad kernel scratch & \SI{1}{\mega\byte} \\
DMA engines & 1 read + 1 write \\
CPU / scheduler overhead & \SI{2}{\nano\second} / \SI{1}{\nano\second} \\
\midrule
\multicolumn{2}{@{}l}{\emph{Memory (per CUBE)}} \\
HBM capacity & \SI{48}{\giga\byte} (8 slices) \\
HBM aggregate BW & \SI{1024}{\giga\byte\per\second} \\
HBM pseudo-channels & 64 (8 per PE), \SI{32}{\giga\byte\per\second} each \\
SRAM (shared) & \SI{32}{\mega\byte}, \SI{128}{\giga\byte\per\second} link \\
HBM burst & \SI{256}{\byte} \\
\midrule
\multicolumn{2}{@{}l}{\emph{Interconnect}} \\
Intra-CUBE NoC link & \SI{256}{\giga\byte\per\second}, \SI{2}{\nano\second}/router \\
Inter-CUBE (UCIe PHY) & \SI{512}{\giga\byte\per\second}, \SI{8}{\nano\second}, XY routing \\
Inter-SIP (PCIe) & \SI{768}{\giga\byte\per\second} per endpoint \\
\midrule
\multicolumn{2}{@{}l}{\emph{Command-issue cost model (defaults)}} \\
FIXED per command & 40 cycles \\
per-byte rate $R$ & 0.0625 cycles/byte (\SI{16}{\byte\per\cycle}) \\
composite size cap & \SI{1024}{\byte} \\
\bottomrule
\end{tabular}
\end{table}
