The pending connection and the per-peer control machine have carried
duplicate copies of the handshake-phase fields since the machine gained
its own connection state. Read them from the machine and drop the
connection's projections.
The peer identity is the sharp one. The connection learned it from msg1
and the machine's carrier did not, so the two views genuinely disagreed
for inbound connections until the Noise operations moved onto the
machine and began recording each result on both. That is now in place,
so every reader can take the machine's copy unchanged: the establish
snapshot, the promotion sweep for competing connections, the dial and
path in-progress checks, the peering observations and per-peer in-flight
budget, and the stale-connection sweep's retry address.
Also repointed: our_index, their_index, transport_id, started_at, the
stored handshake message bytes, and the idle-timeout check. Two
duplicate index writes on the connection are dropped, both immediately
preceded by the machine-side write of the same value. Reads that
previously came off a connection detached just before its machine was
disposed now capture the machine's value first.
Test seeding follows the establish paths: the seed builders write
our_index to the carrier, which promotion now reads. A new test pins
the inbound identity learn on the carrier and the retry address a
failed inbound connection reports to the sweep, so a silent regression
to a blank identity cannot pass.
ConnectionState::duration loses its last non-test caller with the
connection accessor and is marked test-only.
These three had no counterpart on the control machine, so readers still
reached them through the pending connection. Add machine-side
accessors and repoint every reader, then drop the connection's.
The peer address needed its writes lifted, not just its reads
repointed: the machine's copy was never written. It is now written at
each of the points the connection's copy was — the inbound seed, the
dial, message-2 completion, and the two paths that seed a machine from
a pre-built connection — so promotion and the resend path read a value
with the same provenance at the same time as before.
Link and direction need no lift. Both machine constructors already
seed them from the same arguments the connection is built with, so an
outbound machine carries outbound state and an inbound one inbound,
and the machine's link always equals the connection's. The handshake
operations' direction guards read the machine's copy for the same
reason.
The stale-connection sweep's teardown log and its resend path both now
take the transport and address from the machine, and each keeps its own
check that a pending connection is still attached rather than relying
on the caller to have established it.
Add a test pinning link, direction, and address on the two shapes that
seed a carrier independently — the dial and an accepted message 1. The
cross-connection winner reads both values from a carrier one of those
two already seeded.
The pending connection drove its own Noise handshake while the control
machine held it, so the crypto and the state it produces lived on the
carrier that is going away. Move the six operations onto the machine:
starting and completing an initiation, processing an inbound
initiation, taking the session, testing for one, and dropping the
handle on failure. Bodies are unchanged apart from reaching the
handles through the attached connection.
Each operation now records its results on both carriers. The learned
identity, the remote epoch, and the activity stamp are written to the
machine's own bookkeeping at the same point and with the same value as
they are written to the connection's. The connection's copies still
have readers until those reads are repointed, so both have to be
written; the machine's copy of the learned identity was previously
never populated for an inbound connection, which is why an inbound
pending row showed no expected peer.
Driving the handshake from the machine means the machine has to exist
before the crypto runs. On the inbound path it is built above the
message-1 processing and still kept local, so a rejected message
leaves no registry entry and allocates no index. On the outbound path
it already existed from the dial, so it simply takes the connection
before the index allocation, and both failure arms unwind it as they
did.
Completing message 2 no longer mirrors the activity stamp separately,
since the completion itself now writes both carriers at the point the
mirror was approximating.
Three tests cover what the compiler cannot. A connection whose
handshake failed holds neither Noise handle yet must stay visible to
the stale-connection sweep, or every failed connection would leak and
hold a peering-budget slot forever. A message 1 rejected by the crypto
or by the ACL must leave no machine, no index, and the same rejection
count as before. A dial whose message-1 preparation fails must unwind
the machine registered at dial time; that test drives the
index-allocation failure rather than a crypto failure, which is the
arm this change actually widens, since the allocation now happens with
the connection already attached.
`Node::connections()` yielded the pending connection itself, so its
consumers reached the handshake-phase fields through that value. The
pending connection is being folded into the control machine, and the
fields will move off it, so yield the machine (keyed by its link) and
let each consumer reach what it needs from there.
Membership is unchanged: the iterator still selects machines that
carry a pending connection, which is the predicate `connection_count`
and the stale-connection sweep already use. Every consumer takes the
same value from the same place, one hop further out, and no field
changes carrier here.
The method is now internal to the crate. It yields the control
machine, which is not part of the published surface, and nothing
outside the crate iterates pending connections — operator views of
the handshake phase go through the query surface instead.
`promote_connection` detached the pending connection and then
interleaved reads off that detached value with three separate lookups
of the same control machine. Gather the machine-side fields
(`their_index`, `transport_id`, link stats) in the single `get_mut`
that takes the connection, so the machine is borrowed once.
Behaviour is unchanged. The connection is still taken before anything
is validated, so a rejected promotion leaves the machine with no
pending connection, and the prelude only gathers options: the checks
below it still report the first missing field in the same order
(`our_index`, `their_index`, `transport_id`, `source_addr`).
Link stats move to the prelude, ahead of those checks. The value is
the same either way: they live on the surviving carrier rather than
the detached connection, and nothing between the two points touches
the machine map. The lookup could not fail at the old site either,
since the function had already reached it through a successful lookup
on the same key, so dropping the defaulting arm changes nothing.
Add a test covering the error order and the detach, driving promotion
with connections missing each required field in turn plus every later
one, so an implementation that validated during the prelude would
report the wrong field. Test seeding grows a variant that lets the
caller shape the seed.
Tests built a free-standing PeerConnection, mutated it, and handed it to
Node::add_connection by value. None of those sites survives the removal of
PeerConnection, so converting them afterwards would mean one enormous commit
that cannot be reviewed honestly. Convert them now, while the struct still
exists and the conversion can be validated against a green tree.
Adds a cfg(test) Node::seed_handshake_machine plus a HandshakeSeed builder,
and rewrites make_completed_connection (now seed_completed_connection) and
the twenty inline builders onto it. add_connection keeps its body and loses
its test callers.
The builder's carrier seeding is a verbatim copy of add_connection's: the two
conditional writes for their_index and transport_id, then set_leg, through the
same entry().or_insert_with() so an existing leg-less machine keeps its
constructor-side fields. Nothing else reaches the carrier -- our_index,
source_addr, post-construction started_at and the stored handshake bytes stay
leg-only. Seeding more than that would let these tests observe a carrier
richer than production's and keep passing even if a later production
write-lift were missed.
The Noise exchange now runs on the already-seeded leg rather than before the
hand-over. That is neutral because the only read of expected_identity is
guarded by is_outbound, and no crypto method allocates a session index.
Also adds a compile-time check that PeerAction is Clone + Eq, which is what
keeps a runtime handle from being smuggled into an action payload.
The session index was carried three ways: on the leg, on the peer machine's own
connection-state copy, and on a separate machine-owned shadow field. Populate the
machine's connection copy on the outbound path (it was written only on the inbound
and cross-connection-swap paths before), then delete the shadow field and route its
readers, the decrypt-registration lifecycle, and the rekey cutover through the
single carrier. The shadow and the connection copy diverged only on paths that are
unreachable or dormant in production (a rekey cutover with no newly allocated index,
the swap winner's later reads, and the never-dispatched timeout/disconnect events),
so the merge is byte-identical for every reachable path. Rewrote the outbound-promote
index tests and the dial-time comment for the single-carrier contract.
The connection leg's their_index, transport_id and link_stats duplicated the peer
machine's own connection-state copy. Route every production reader through the
machine copy: promotion, the stale-connection reaper, the outbound msg1 resend, and
the in-use / connecting-path checks. Seed the inbound machine's transport_id from the
msg1 packet (the same source the leg used), matching the outbound dial seed, so the
hard-required promote read never sees a missing transport. link_stats is a
never-mutated zero seed, so its leg accessors are removed outright; the leg
their_index/transport_id getters/setters remain only for the test-only connection
builder. Also delete the write-only next_resend_at_ms field from the connection
state (the resend deadline is carried by the machine-armed retransmit timer, not this
field). Byte-identical.
The connection leg's stored msg1/msg2 handshake-resend buffers duplicated the
peer machine's own connection-state copy. Write the machine copy at the outbound
msg1-prep and the two inbound authorize sites, then source the retransmit
resend-bytes reader, send_stored_msg1, and the pending tier of find_stored_msg2
from the machine. The post-promote active-peer msg2 copy is written from the same
wire bytes, so the pending tier now matching after promotion is value-identical.
Byte-identical resend behavior.
The expected_peer connection-row field read the peer identity off the leg;
source it from the machine's own connection-state copy instead, matching the
started_at/last_activity treatment. The machine carrier holds the same identity
as the leg for every connection that appears in the view: outbound legs seed
both from the dialed identity, and inbound legs never rest in the connections
view (the machine takes the leg at promotion), so their machine copy is
unobserved. The leg accessor stays for the crypto-extraction path and retry
decisions. Byte-identical.
The connection leg's started_at and last_activity duplicated the peer
machine's own connection-state copy. Make the machine copy the sole live
telemetry and timeout carrier: re-stamp it with the leg's provenance when
the leg is attached at handshake start (the msg1-prep clock, not the earlier
dial-time constructor value) and mirror the completion touch, then delete the
leg's last_activity/touch accessors and source the connection-row projection,
show_connections, and the timeout readers from the machine. Byte-identical
for all normal paths.
The connection leg's HandshakeState field duplicated the peer machine's
handshake phase. Delete it and derive the displayed handshake state string
from the machine's PeerState, looked up by link id (mirroring the resend
count). Move the failure signal onto the machine: a send_failed flag that
preserves retransmit eligibility (the machine stays in its handshake phase),
alongside the existing Failed state. The leg's crypto self-gates now guard on
Noise handle presence instead of the deleted phase field, and mark_failed
only drops the handle. Telemetry strings, wire bytes, index allocation, and
the stale-connection reaping are byte-identical for all normal paths.
handle_msg1 now creates one local machine before classification and routes
on the InboundDecision it returns, instead of calling establish_inbound in
the shell and re-deriving the decision inside each arm. The promote and
restart arms drop their own per-arm machine construction and the redundant
InboundMsg1 step; their phase-1 actions come from the single call. The
effect-bearing arm bodies (rekey-respond, duplicate resend, reject
bookkeeping, and the promote/restart tails) are unchanged.
Behavior-neutral: the same establish_inbound evaluation over the same
snapshot and wire, done once in the machine method rather than once in the
shell, with byte-identical arm bodies and no change to index allocation,
wire sends, machine state, or telemetry.
Make the FIPS core build and run as an embedded Android library. The host
app owns the TUN (e.g. an Android VpnService) and FIPS performs no
system-TUN or CAP_NET_ADMIN operations.
Squashed from the following changes:
- gate desktop transports/TUN by target_os, not features: a plain
`cargo build` now compiles for every target with no flags. Ethernet (raw
AF_PACKET / BPF) is gated to linux/macos, so Android (target_os =
"android", not "linux") self-excludes it as Windows already did; real
system-TUN ops are gated per linux/macos and Android gets a no-op stub;
the ipi6_ifindex cast handles it being i32 on Android vs u32 on macOS. No
Cargo features are introduced; desktop builds are unchanged.
- app-owned TUN seam: Node::enable_app_owned_tun() lets an embedder that
owns the TUN fd exchange IPv6 packet bytes with FIPS over channels
instead of FIPS creating a system TUN device. It returns (app_outbound_tx,
app_inbound_rx): the embedder pushes packets read from its fd into the
outbound sender (app -> mesh) and pulls packets destined for its fd from
the inbound receiver (mesh -> app). start() gates system-TUN creation on
tun_tx being unset, so with the channels pre-installed it skips device
creation and does no system-TUN ops; both directions reuse the existing
inbound-shim and run_rx_loop wiring. Packets entering via app_outbound_tx
bypass handle_tun_packet, so the embedder must push only fd00::/8-destined
packets and clamp TCP MSS on outbound SYNs; the rustdoc and the
IPv6-adapter design doc spell this out.
- keep the android target warning-clean so the cross-compile check passes
clippy -D warnings.
- add an Android cross-compile CI check: cross-compile the library for
aarch64-linux-android via cargo-ndk and run clippy -D warnings. Android
ships as an embedded library (the host app owns the TUN), so there is no
daemon binary to package; this is a check job, not a packaging one.
- docs: list Android as a supported platform.
Tests: app_owned_tun_seam_wires_channels covers the channel round-trip and
the Active state; start_skips_system_tun_when_app_owned runs start() and
asserts no named system device is created.
The inbound msg1 machine arm re-derived the establish decision for
its own action selection while the shell matched on a separately
computed copy. Expose the arm as a method returning the decision
alongside the actions so a driver can route on it directly; the
step dispatch delegates and keeps its action-only shape.
The dead rekey-respond arm is stripped to decision-only and its
helper deleted: it allocated from the real index allocator, wrote
the rekey shadow index, emitted a wrong-framed rekey send, stamped
the dampening clock, and flipped state, none of which happens on
the live path, where the inline respond body owns all effects. The
resend-msg2 arm's send emission is stripped the same way; the
decision already carries the stored bytes.
send_stored_msg1 marked the embedded leg failed by writing it
directly from the shell. Route the write through a new
HandshakeSendFailed machine event instead: the machine marks its
leg so the stale-connection sweep reclaims it, without leaving the
handshaking state, so retransmit eligibility survives the window
between the failed send and the sweep exactly as before.
send_stored_msg1 gains a now_ms parameter threaded from the action
executor for the step call; the failure arm itself ignores it.
handle_msg2 no longer pre-computes establish_outbound alongside the
machine's own evaluation of the same snapshot. The shell now builds
the snapshot, steps the persistent outbound machine once at the
decision point, and routes on what comes back: the promote action
vector drives promotion through the executor as before, and the
ResolveCrossConnection decision selects the inline swap/keep
resolution bodies, which are unchanged.
The machine step and its defensive transient-rebuild move up from
the promote arm to the decision point; the cross-connection path
keeps its take-leg-then-dispose ordering with the step preceding
both. Comment prose at the touched sites refreshed to describe the
single-decision-site shape.
The machine's on_msg2 cross-connection arms crystallized state and
emitted FreeIndex/RegisterDecryptSession actions that duplicate the
inline shell resolution, but they are unreachable on the live path
(the shell removes the machine before running the swap/keep bodies).
Making them live in that shape would double-free the outbound index
through the executor.
Strip both arms to a single new ResolveCrossConnection { swap }
action: a decision conveyed to the driver, not an effect. The shell
intercepts it and runs the inline resolution, which owns all effects
permanently. The action executor gets a defensive unreachable arm.
The Promote arm and set_their_index are unchanged.
The pending-handshake PeerConnection map and the per-peer control
machine map were parallel LinkId-keyed structures whose keysets must
stay coherent by hand. With every leg now born with a machine, the leg
becomes storage inside its machine (leg: Option<PeerConnection>, pure
storage the machine never reads or drives) and Node loses the
connections field; every access routes through the machine.
The non-mechanical lowerings, each argued at the site: the
rekey-vs-establish gate in handle_msg2 tests leg-absence (an established
peer's machine stays keyed by its link, so machine-presence would
misclassify every rekey msg2 as a fresh establish); the
connecting-predicates, peering observation, and handshake-slot budget
iterate machines-with-legs so connect-window machines (leg not yet
born) are excluded exactly as before and never double-counted against
their pending-connect slot; the cross-connection extract takes the leg
before disposing the machine; the stale reaper takes the leg and leaves
the machine untouched when none is present, matching the old early
return. The map-coherence debug check keeps its machine-has-carrier
direction with the embedded leg as a carrier; the leg-to-machine
direction is now true by construction and its gate const is gone.
connection_count() counts machines with legs; the connections()
iterator, the test seams, and the control-socket connection rows are
re-implemented over the embedded legs with unchanged output.
Assert, once per tick in debug builds, that the peer control-machine map
and its carriers stay coherent: every control machine has a live
handshake leg, an active peer, or a pending connect (a machine with none
is a leak the stale reaper can never see), and every handshake leg has a
machine. The second direction sits behind a file-local const so a branch
where handshake-window legs legitimately run machine-less can gate it
off without weakening the leak tripwire.
Teach the add_connection test seam to seed a control machine for the leg
it inserts (derived from the connection's direction and identity), and
remove_connection to dispose it, so the seam-built topologies satisfy
the check. Three unit tests: seam coherence, coherence through a real
promotion, and the orphaned-machine panic.
Several module and field docs still described the per-peer machine as
unwired shadow scaffolding. It has been live for some time: machines are
inserted at dial and inbound msg1, stepped by the handshake handlers and
the rekey-cadence and liveness-reap routers, and the executor's
SwapSendState/CompleteDrain/InvalidateSendState arms are the authoritative
paths (the inline bodies survive only as debug-assert release fallbacks).
Rewrite those docs to the current truth while keeping the still-true
dormancy facts: PeerEvent::Timeout and PeerEvent::Tick are never
dispatched in production, retransmit fires on the machine-armed deadline
while the timeout reaper keys on timer presence with the config
threshold, and the remaining inert executor stubs are SendRekey,
SendLinkMessage, and the connected-UDP arms. Drop the stale
allow(dead_code) on the peer_machines field.
PeerSlot (and its entire impl surface) was referenced only by its own
module tests and the lib.rs re-export; peer storage has always used the
separate connections/peers maps. PeerConnection's resend_count/
next_resend_at_ms/record_resend delegations had no production callers:
the live resend counter is machine-sourced (connection_resend_count reads
the per-peer machine), and the FSP session layer uses SessionEntry's own
methods. ConnectionState::next_resend_at_ms is now test-only (its
remaining callers are the fmp state unit tests) and marked cfg(test).
The PeerSlot unit tests go with the enum; test_resend_count_tracking is
dropped because the delegation target's schedule arithmetic is already
covered by the fmp resend_bookkeeping test.
Router-to-router radio backhaul over an open 802.11s mesh interface,
with FIPS providing all encryption (Noise IK), authentication, and
routing on top of bare L2 neighbor links. The mesh runs OPEN with
mesh_fwding 0 — SAE would duplicate the Noise layer and force ath10k
raw mode, and FIPS is the routing layer — so the Noise handshake is the
real auth/encryption boundary and FIPS's spanning tree does the routing.
fips-mesh-setup: an opt-in UCI helper that creates a per-radio
mesh-point interface (radio0 -> fips-mesh0, radio1 -> fips-mesh1;
trailing-digit derivation with a free-index fallback and a collision
guard). Radio setup stays opt-in — a package must not commandeer radios
on install. 'remove' takes an optional radio and otherwise removes all
instances. Dual-band routers get one instance per radio; FIPS treats the
two backhaul paths as failover, not multipath: it keeps one active link
per peer (cross-connection resolution picks a single winner), and the
second band stands by, re-establishing the peer after keepalive timeout —
traffic never uses both bands at once.
fips.yaml ships the mesh0/mesh1 Ethernet-transport entries commented
out, so a stock install that never creates fips-mesh* logs no per-boot
"interface missing" bind warning. fips-mesh-setup uncomments the matching
meshN block when it creates the interface and re-comments it on remove,
so the flash-and-drop-in flow needs no manual config edit. The file is
rewritten 0600-first (it may hold an inline nsec) via an atomic replace.
Two field-found silent non-peering causes are surfaced by the helper and
the guide:
- Same channel: mesh points only peer on a shared channel, and 'auto'
lets each radio pick its own. The helper prints the radio's
band/channel and warns loudly on 'auto' with the exact uci command to
pin one; the how-to gains an ordered no-peers triage (channel mismatch,
on-air scan check, DFS CAC wait, regdomain).
- STA channel capture: a client (sta) interface drags the whole radio to
its upstream AP's channel, so a mesh pinned elsewhere never joins and
does not recover until the STA disconnects. The helper warns when the
target radio carries a STA; the guide documents the incompatibility of a
roaming uplink with a fixed-channel mesh on the same radio.
Both the create and remove paths run 'wifi reload', which briefly drops
every client AP on all radios; the how-to sets that expectation.
Regression test: the shipped OpenWrt fips.yaml must parse via the real
Config deserializer in both states — as shipped (mesh inactive) and after
the uncomment the helper performs.
Packaging: the helper is installed across the ipk/apk/buildroot paths
(three synced copies), with the CI structural checks and shellcheck
targets extended to cover it. Full guide in
docs/how-to/set-up-80211s-mesh-backhaul.md.
Phase 4 of the rekey suite waited for only one more initiator cutover
(guaranteeing three) while Phase 6 asserts at least four. The fourth
cutover then had to land in the brief window between the wait returning
and the Phase 6 log snapshot, so host load could push it past the window
and fail the run even though every cutover completed correctly. Wait for
two more cutovers, the full second rekey cycle, matching the Phase 6
threshold, so the asserted count is guaranteed before it is checked.
Feed the per-peer machine two observation events so its control/rekey
shadow state stays coherent with the inline crypto-session installs,
without moving those installs. The crypto effect bodies are unchanged.
On rekey-msg2 completion, feed the machine the responder index on the
success path only (after the pending session is installed); the abandon
path feeds nothing.
On cross-connection resolution, feed the machine the swap outcome: on a
swap it records the new outbound and responder indices to mirror the
session replacement, and on a keep it does nothing. The observation
targets the promoted peer's machine, not the outbound leg whose machine
is removed as the block is entered.
Both observation handlers emit no action; nothing consumes the updated
shadow state yet.
Move the outbound handshake-timeout reap off the unconditional check_timeouts
scan onto the machine-armed HandshakeTimeout timer. A new drive_handshake_timeouts
(run before the retransmit drive, so a timed-out leg is reaped rather than resent
on the same tick) reaps the outbound legs that carry a HandshakeTimeout timer and
have idle-timed-out this tick.
The timer's presence selects the leg (only outbound legs arm one; IK inbound arms
none); the reap threshold is the shell is_timed_out(now, config) predicate, not
the timer's stored deadline. The machine arms the timer from a hardcoded constant
at dial, which is not authoritative for an operator-tuned handshake_timeout_secs,
so reading the threshold from config each tick keeps the reap neutral for any
timeout value and on the last_activity clock exactly as before.
check_timeouts keeps reaping everything else: failed connections (all of them,
promptly) and the idle-timeout of legs without a machine timer (inbound legs, and
any machine-less connection). Total coverage is unchanged. check_timeouts runs
before the timer drive, so a failed outbound leg is reaped there first, its timers
dropped, and the timeout drive never double-fires on it.
Split drive_peer_timers into the timeout drive and the (byte-identical) retransmit
drive. The dormant machine timeout handler is not dispatched, so the session index
is freed once, by cleanup_stale_connection. A regression test drives a timed-out
outbound leg to reap; the existing check_timeouts tests continue to anchor the
residual sweep. Test count 1631 to 1632.
Move the outbound msg1 resend off the unconditional tick function onto the
machine-armed retransmit timer. The per-peer machine already arms a
HandshakeRetransmit deadline at dial; a new drive_peer_timers fires the due ones
(kind-filtered to the retransmit timer) and homes the resend counter on the
machine, where the operator-visible count now reads from.
The resend decision reads the same operator config as before (interval, backoff,
max), the wire bytes and transport target still come from the shell connection,
and the pure core computes the backoff schedule. As with the deleted
resend_pending_handshakes, the count and reschedule advance only on a successful
send: a failed send neither advances the count nor marks the connection failed,
it just retries on the next tick. The handshake-timeout timer stays on the legacy
check_timeouts path, and the rekey/liveness timers keep their own shell drivers,
so drive_peer_timers deliberately fires only the retransmit kind.
The show_connections resend count is relocated to read from the machine (the
counter's new home) via connection_resend_count; machine-less and inbound
connections report 0, matching what the shell connection reported before. Delete
resend_pending_handshakes and resend_candidates (the latter also from the
LifecycleView trait, its only user). The resend unit test is re-expressed against
the machine + timer path, covering the due check and the record-on-success
semantics.
Known limitation: the first resend interval is armed from the machine's hardcoded
1000ms constant, which equals the config default. Under an operator override of
handshake_resend_interval_ms the first resend diverges from the pre-change
dial+interval; subsequent resends and the cap remain config-driven. Neutralizing
the first-resend override needs the interval threaded into the sync core (the
shell arm would be clobbered by the machine's own timer arming at dial), deferred
to when the connection and machine entities merge. Test count unchanged at 1631.
The control machine already emits SetTimer/CancelTimer actions when it arms the
handshake retransmit and timeout deadlines, but their executor arms were a
single no-op stub and the machine's Timeout event was never dispatched -- the
real work still runs on the legacy tick (check_timeouts,
resend_pending_handshakes).
Add the storage the time-as-input driver will read: a peer_timers map keyed by
LinkId then TimerKind, holding each armed timer's absolute deadline. The SetTimer
arm now inserts (overwrite = reschedule) and CancelTimer removes; the outbound
msg2 promote cancels the two dial-armed handshake timers, since the machine
survives promotion and the entries would otherwise linger in the store.
This store is a shadow: it is written and cleared but no driver reads it yet, so
behavior is unchanged. The legacy tick stays authoritative until the driver that
feeds Timeout and deletes the overlapping tick paths lands.
Route every machine removal through a new remove_peer_machine(link) choke-point
that drops the timer store alongside the machine, replacing the twelve direct
peer_machines.remove sites so no armed timer outlives its machine. TimerKind
gains Hash (to key the store) and Ord (for deterministic driver collection); it
is internal and never serialized. Test count unchanged at 1631.
Route the connection-oriented (TCP/Tor) outbound path through the peer state
machine, matching how the connectionless path already works.
initiate_connection's oriented branch now drives PeerEvent::Dial with
connection_oriented=true; the machine parks in Connecting and emits
OpenTransport, whose executor arm performs the non-blocking transport.connect
and pushes the PendingConnect. When the connect resolves, poll_pending_connects
prepares msg1 in the shell and then drives PeerEvent::TransportConnected, which
sends msg1 via the machine's SendHandshake arm.
The msg1 prepare (index allocation, Noise leaf, wire arming) MUST run in the
shell before the TransportConnected drive: send_stored_msg1 only transmits an
already-armed wire, so a drive-only path would silently send nothing. The
machine's our_index stays unset; the connect-failure path keeps its direct
handshake-timeout handling (TransportFailed stays dormant). The now-unused
Node::start_handshake helper is removed.
Behavior-neutral: same transport.connect, same PendingConnect, same msg1 send
and failure teardown as the removed inline path -- only the driver changes from
inline shell code to the state machine.
Move the peer_machines insert for an outbound leg out of the tail of
prepare_outbound_msg1 to a single shared site in initiate_connection, before
the connection-oriented / connectionless fork. This lets the connection-oriented
path find the machine at dial time (so it can be driven through the connect
handshake) without prepare_outbound_msg1 -- which for that path runs after the
connect completes -- clobbering an in-progress machine back to Discovered.
Because the machine now exists before the fallible dial steps, add
peer_machines.remove to every failure path in the widened dial window: the
index-allocation and Noise-leaf failures in prepare_outbound_msg1, the oriented
transport.connect failure, and both poll_pending_connects teardown arms
(handshake-start failure and async connect failure). remove_link does not touch
peer_machines, so these explicit removes are required.
Behavior-neutral: the connectionless path still drives the machine to
Handshaking and sends msg1 identically; the machine's our_index stays unset
(no spurious UnregisterDecryptSession on a later inbound restart); a failed dial
leaves peer_machines empty for that link exactly as before; and no
connection-oriented machine drive is wired here.
The connection-oriented (TCP/Tor) outbound connect->handshake path had no
`cargo test --lib` coverage; it was exercised only by the opt-in Tor
integration suites, and the TCP node tests bypass it via a manual
connectionless handshake helper. Add three unit tests:
- a machine-level test driving Dial{connection_oriented:true} -> Connecting
(emitting only OpenTransport, no msg1) -> TransportConnected ->
Handshaking{SentMsg1}, asserting the exact OpenTransport and
SendHandshake+SetTimer action vectors that start_outbound_handshake emits
(its oriented reach via on_transport_connected was previously untested; the
connectionless reach via on_dial was already covered);
- two node-level tests over a real loopback TcpTransport: a successful connect
that reaches start_handshake (observed via a pending_outbound entry), and a
connect to a closed port that routes through the failure arm (link torn down,
no msg1 dispatched).
Tests only; no production change.
Split the outbound handshake setup out of start_handshake into
prepare_outbound_msg1 (allocate the index, run the Noise leaf, frame and arm
msg1 -- the fallible steps, returning an error the caller propagates) and
send_stored_msg1 (transmit the armed wire). A connectionless dial now runs
prepare in the shell, then drives the control machine, whose SendHandshake
action sends the wire via the executor. Connection-oriented dials keep calling
start_handshake, now prepare followed by the send inline.
The dial event gains a connection_oriented flag so the machine's on_dial sends
msg1 immediately for connectionless transports (no connect step) instead of
opening a transport first. Behavior is unchanged: the same index, Noise leaf,
wire bytes, maps, and send-error handling as before, with index-allocation and
Noise failures still propagated synchronously before the send. A regression
test covers that a promote from the post-dial handshaking state is identical to
the former discovered-state promote.
Create and persist the per-peer control machine when an outbound handshake is
dialed, keyed by its link, instead of building a transient at msg2. The msg2
completion path now looks up that persisted machine to drive the promote,
falling back to a transient only if none is present (e.g. a direct-seeded test).
The machine parks in the Discovered state until promotion and is inert to the
liveness reap and rekey cadence while unpromoted, since it is absent from the
peers map. It is removed on every path that ends the outbound leg without
promoting -- the stale-connection reaper, the msg2 authorization-failure arm,
and the cross-connection resolution block -- mirroring the connection's own
lifetime so no dangling machine survives.
Its session index is deliberately left unset on the machine (the shell owns the
index on its connection), so a later inbound restart does not emit a spurious
decrypt-session unregister. A regression test covers that invariant.
Add a LostKind discriminator to the ReportLost action so the executor can
route an un-promoted handshake failure to the connected-guarded reconnect
reflex (note_handshake_timeout) and an established peer's link-death to the
unconditional one (note_link_dead), instead of collapsing every loss to
note_link_dead.
The two loss producers dispatched today, the liveness reap and the
inbound-restart-then-promote arm, both keep the link-dead routing, so
behavior is unchanged. The handshake-timeout and dial-failure producers are
tagged accordingly but stay dormant until their events are dispatched.
Remove the now-stale `#[allow(dead_code)]` on `advance_peer_machine`
and `execute_peer_actions`; both are live (called from the link-dead
reap, rekey cadence routing, and the handshake establish sites).
In `route_rekey_cadence`, reuse the ambient context timestamp for the
machine step instead of taking a second clock sample; the extra
sample's only consumer was the currently-inert cutover drain timer, so
the change is behavior-neutral.
Prove the per-peer machine's action type is a runtime-agnostic message
contract: it is Send + Sync + 'static, and every variant round-trips
unchanged through a single-threaded async channel (a current-thread runtime,
sender and receiver on one thread). A wildcard-free match over the variants
makes any future action a compile error here until it is added to the sample,
so a variant that embedded a runtime handle could not slip through unproven.
The two promote-failure warn! sites in the peer-action executor emit under
this module's own tracing target rather than the handshake target the rest of
the establish-path logging uses. Pin both (outbound "Failed to promote
connection" and inbound "Failed to promote inbound connection") to
fips::node::handlers::handshake, matching the sibling max-peers reject log and
keeping all establish-path diagnostics grouped under one target regardless of
which module physically emits them.
Comments across the per-peer machine, executor, lifecycle supervisor,
and peering reconciler carried internal rollout labels and design-note
section references. Rewrite them to describe the code's behavior
directly. Comment-text only; no code changes.
Route each link-dead peer that the tick sweep's plan_heartbeats decides
to reap through the per-peer machine and executor, replacing the inline
reap body in check_link_heartbeats. The batch decision, the liveness
snapshots (read from the hot-path-written receive clock), and the
heartbeat-send arm stay shell-side and byte-unchanged; the machine only
consumes the decided LinkDeadSuspected, tearing the peer down via
remove_active_peer and reporting the loss to the reconciler exactly as
before, on the same tick with the same wall-clock timestamp. The reap
log stays shell-side.
The machine's link-dead handler no longer emits a decrypt-session
unregister keyed by its shadow index (the full peer teardown already
unregisters the real index; the shadow could have drifted to a reused
index), and its guard now covers the Established state a freshly
promoted peer sits in.
Handshake-timeout, retransmit, and stale-connection cleanup stay inline:
they act on pre-promotion legs that have no machine, and the loss reflex
they use differs from the link-dead one.
Route each Cutover and Drain that the shell-side batch poll_rekey decides
through the per-peer machine and the executor, replacing the inline
effect bodies in check_rekey. The batch decision and its per-peer
snapshots stay shell-side and byte-unchanged: poll_rekey phase-groups all
cutovers, then all drains, then all initiations across the peer set, and
that ordering governs the shared index allocator's free-then-allocate
sequence that appears on the wire, so the machine only consumes the
already-decided actions (a new RekeyConsume event) without re-deciding.
InitiateRekey stays inline (its Noise msg1 build is a shell-side leaf)
with a RekeyInitiated observation feeding the machine so its control
state stays coherent for the next tick's cutover.
The cutover and drain logs, which relocated into the executor in the
prior commit, are pinned back to the fips::node::handlers::rekey tracing
target so they stay visible under the operator's module log filter.
Also clears the machine's shadow draining_index on drain so a later
cross-connection resolution cannot double-free the already-freed index.
Prepare the establish executor to drive FMP rekey by activating the
SwapSendState action (initiator K-bit cutover via cutover_to_new_session,
with the gated decrypt-worker re-registration) and adding a CompleteDrain
action (erase the drained previous session: free its index, drop its
peers_by_index entry, unregister its decrypt session). Both reproduce the
current inline rekey.rs cutover and drain bodies. The machine's drain
mapping now emits CompleteDrain, using the real drained index rather than
a shadow copy.
Unwired: nothing drives the machine's rekey path yet (live rekey still
runs inline), so these arms are unreachable and the change is
behavior-neutral. The cadence fold that routes cutover and drain through
the machine follows.
Move register_decrypt_worker_session out of promote_connection into the
executor's PromoteToActive handler, gated on a promoted or
cross-connection-won result. Every live promote now flows through that
one executor path, so registration still fires exactly once at the same
synchronous point; the direct test callers of promote_connection spawn
no worker pool, so the call was already a no-op for them.
Add the cross-connection loser-link teardown (close the losing
transport, remove its link, re-point addr_to_link at the winner) to the
executor as a guarded follow-up. It is unreachable on the current driven
establish paths, which only promote net-new peers, and asserts so, but
keeps the executor complete for when that case is driven.
Remove the now-dead drive_promote_to_active and ConnAction::PromoteToActive.
Cut the net-new outbound handshake completion (a received msg2 that
promotes a fresh outbound leg to a new peer) over to the per-peer
control machine, mirroring the inbound cutover. handle_msg2 still runs
the msg2 prologue, the ACL check, and the cross-connection swap/keep
arms inline; for the net-new promote it now builds a transient machine,
steps it, and drives promote_connection through the executor. The
session index was already allocated at dial, so there is no two-phase
authorize here.
The wire, index sequence, and peer registry state after promote are
byte-neutral. To keep the promote-failure path neutral, the executor's
cleanup now distinguishes inbound from outbound: an outbound promote
failure records the reject only, matching the prior handler, rather
than the inbound path's link and index teardown.
Cross-connection swap/keep, rekey-msg2, and the dial path stay inline;
the loser-link surgery for the currently unreachable driven
cross-connection case lands with the register relocation next.
Cut the restart handshake (an inbound msg1 from a peer that reconnected
with a new epoch) over to the per-peer control machine, completing the
inbound establish cutover. The old peer is torn down and the fresh leg
promotes through the same two-step authorize-then-allocate path as the
net-new case: the machine's first step emits the old-peer teardown
(invalidate send-state, report loss), the shell interposes the ACL
check, and the second step allocates the new index and sends msg2. The
old index is freed before the new one is allocated and the msg2 wire
bytes are unchanged, so the sequence stays byte-neutral.
With restart driven through the machine, the shared inline establish
tail that only the restart arm reached is deleted.
Also bounds the peer_machines map (remove_active_peer now drops the
peer's machine entry) and restores the msg2-send, promote, and
index-allocation failure warnings the cutover had dropped.
Cut the net-new inbound handshake (a fresh msg1 that promotes to a new
peer, plus the at-capacity reject) over from the inline handle_msg1 logic
to the per-peer control machine. handle_msg1 still classifies via
establish_inbound and still owns the Noise wire step, the late ACL check,
and the promote_connection registry surgery; for the net-new path it now
builds the machine, steps it, and executes the returned actions.
Authorization is interposed between two machine steps so the session
index is allocated only after the ACL check passes: a rejected or
unauthorized msg1 consumes no index, matching the prior order exactly.
The msg2 wire bytes, the index-allocation sequence, and the reject
metrics are all byte-neutral. Restart, resend, rekey-respond, and the
other reject arms stay inline unchanged; they move to the machine once
outbound establish is cut over and every promoted peer has a machine.
Also fills in the executor's send-failure and promote-failure cleanup so
a mid-establish error tears the leg down and frees its index exactly as
before.
Add Node.peer_machines (a LinkId-keyed map from the stable link handle to
the per-peer control machine) as the home for the machines, and a new
dataplane/peer_actions.rs holding execute_peer_actions / advance_peer_machine:
the executor that maps each PeerAction the machine emits to its shell call —
frame and send a handshake via build_msg2, drive promote_connection and feed
the PromotionResult back through the machine, tear a peer down via
remove_active_peer, free session indices, report loss via note_link_dead.
Actions for the rekey, connected-UDP, and timer paths are stubbed with notes
for the commits that fold those mechanisms in.
Unwired: nothing drives the machine yet — no live handler path calls the
executor and peer_machines is never populated — so this is behavior-neutral;
the inbound and outbound establish paths still run their existing inline
logic. The executor is cut over path-by-path in the following commits.
Draw the control/published-send-state boundary inside ActivePeer by
grouping the send-critical fields — the three epoch session slots
{current, previous, pending}, the K-bit flag and session-start, the
transport target, the connected-UDP handles, and the hot counters —
into a new co-located PeerSendState struct. The control-tier fields
(identity, connectivity, declaration/ancestry, filter and tree-announce
groups, remote_epoch, the rekey-negotiation sub-machine, and the rest)
stay on ActivePeer.
Behavior-neutral: a pure field regrouping. Every accessor signature is
unchanged (bodies now read/write self.send.*), so the hot path and the
handlers are byte-untouched; both K-bit cutovers still rotate the three
slots atomically with the same control-tier updates. No Arc/ArcSwap —
the fields are co-located and read by plain borrow; publishing behind a
shared cell is later plumbing for a sharded data plane.
Introduce src/peer/machine.rs: a sans-IO per-peer control FSM that
consolidates the scattered handshake/rekey/timeout driver logic now
spread across node/handlers. The machine is a pure reducer —
step(event, now, index_allocator) -> [action] — that reuses the
existing FMP decision cores (establish_inbound/establish_outbound/
cross_connection_winner/poll_*) rather than reimplementing any
decision, and returns runtime-agnostic actions the driver executes.
Control-tier state only; the published send-state boundary and the
driver wiring land in following commits. The machine is terminal at
Closed — re-dial is the reconciler's, so it holds no cross-attempt
retry state.
Includes eight unit tests: inbound and outbound establish, N:1
identity crystallization, the dual-initiation tie-break,
restart-override, rekey initiator cutover, the data-plane-owned
responder cutover boundary, and liveness -> link-dead -> report-lost.
Unwired — nothing calls it yet.
Johnathan Corgan
ArjenandJohnathan Corgan