* Re-org internal descriptor `CanonicalDesc` as `PivotArc`
why:
Despite its name, `CanonicalDesc` contained a cursor arc (or leg) from
the base tree with a designated block (or Header) on its arc members
(aka blocks.) The type is used more generally than only for s block on
the canonical cursor.
Also, the `PivotArc` provides some more fields for caching intermediate
data. This simplifies managing extra arguments for some functions.
* Remove cruft
details:
No need to find cursor arc if it is given as function argument.
* Rename prototype variables `head: PivotArc` to `pvarc`
why:
Better reading
* Function and code massage, adjust names
details:
Avoid the syllable `canonical` in function names that do not strictly
apply to the canonical chain. So renaming
* findCanonicalHead() => findCursorArc()
* canonicalChain() => findHeader()
* trimCanonicalChain() => trimCursorArc()
* Combine `updateBase()` function-args into single `PivotArgs` object
why:
Will generalise action for more complex scenarios in future.
* update `calculateNewBase()` return code type => `PivotArc`
why:
So it can directly be used as argument into `updateBase()`
* Update `calculateNewBase()` for target on parent arc
* Update unit tests
Each branch node may have up to 16 sub-items - currently, these are
given VertexID based when they are first needed leading to a
mostly-random order of vertexid for each subitem.
Here, we pre-allocate all 16 vertex ids such that when a branch subitem
is filled, it already has a vertexid waiting for it. This brings several
important benefits:
* subitems are sorted and "close" in their id sequencing - this means
that when rocksdb stores them, they are likely to end up in the same
data block thus improving read efficiency
* because the ids are consequtive, we can store just the starting id and
a bitmap representing which subitems are in use - this reduces disk
space usage for branches allowing more of them fit into a single disk
read, further improving disk read and caching performance - disk usage
at block 18M is down from 84 to 78gb!
* the in-memory footprint of VertexRef reduced allowing more instances
to fit into caches and less memory to be used overall.
Because of the increased locality of reference, it turns out that we no
longer need to iterate over the entire database to efficiently generate
the hash key database because the normal computation is now faster -
this significantly benefits "live" chain processing as well where each
dirtied key must be accompanied by a read of all branch subitems next to
it - most of the performance benefit in this branch comes from this
locality-of-reference improvement.
On a sample resync, there's already ~20% improvement with later blocks
seeing increasing benefit (because the trie is deeper in later blocks
leading to more benefit from branch read perf improvements)
```
blocks: 18729664, baseline: 190h43m49s, contender: 153h59m0s
Time (total): -36h44m48s, -19.27%
```
Note: clients need to be resynced as the PR changes the on-disk format
R.I.P. little bloom filter - your life in the repo was short but
valuable
* Kludge: fix `eip4844` import in `validate`
why:
Importing `validate` needs `blscurve` here or with the importing module.
* Separate out `FC` descriptor iinto separate file
why:
Needed for external descriptor access (e.g. for debugging)
* Debugging toolkit for `FC`
* Verify chain descriptor after changing state
* Cosmetics, update log and exception messages
* Update `FC` base tree updater `updateBase()`
why:
Correct `forkJunction` of canonical cursor head record. When moving
the `base`, this field would be below `base` unless updated.
* Fix `FC` chain selector `findCanonicalHead()`
why:
Given a sample ref `hash` the function searched for the unique chain
containing the block header referenced by `hash`.
Unfortunately, when searching down the ancestry lineage, the function
did not necessarily stop an the end of the sub-chain. Rather it
continued with the parent chain without noticing. So returning the
wrong result.
* When calculating new a base it must reside on cursor arc (or leg.)
why:
The finalised block argument (that will eventually be the new base)
might be moved further down the cursor arc if it is too close to the
cursor head (typically smaller than 128 blocks.)
So the finalised block selection is shifted down he cursor arc. And
it might happen that the cursor arc itself is too small and one would
end up at a parent cursor arc. This is rejected.
* Not starting a new cursor arc with a block already on another arc
why:
This leads to an inconsistent set of cursor arcs which are supposed to
be mutually disjunct.
* Tighten condition: A block that is not on the base tree must be on the DB
* One less TODO item
The EVM stack is a hot spot in EVM execution and we end up paying a nim
seq tax in several ways, adding up to ~5% of execution time:
* on initial allocation, all bytes get zeroed - this means we have to
choose between allocating a full stack or just a partial one and then
growing it
* pushing and popping introduce additional zeroing
* reallocations on growth copy + zero - expensive again!
* redundant range checking on every operation reducing inlining etc
Here a custom stack using C memory is instroduced:
* no zeroing on allocation
* full stack allocated on EVM startup -> no reallocation during
execution
* fast push/pop - no zeroing again
* 32-byte alignment - this makes it easier for the compiler to use
vector instructions
* no stack allocated for precompiles (these never use it anyway)
Of course, this change also means we have to manage memory manually -
for the EVM, this turns out to be not too bad because we already manage
database transactions the same way (they have to be freed "manually") so
we can simply latch on to this mechanism.
While we're at it, this PR also skips database lookup for known
precompiles by resolving such addresses earlier.
why:
The `base` block is ancestor to all blocks of the base tree bust stays
outside the tree.
Some fringe condition uses an opportunistic fix when the `cursor` is not in
the base tree, which is legit if `cursor != base`.
* Inline gas cost/instruction fetching
These make up 5:ish % of EVM execution time - even though they're
trivial they end up not being inlined - this little change gives a
practically free perf boost ;)
Also unify the style of creating the output to `setLen`..
* avoid a few more unnecessary seq allocations
* Ignore `FC` overlapping blocks and the ones <= `base`
why:
Due to concurrently running `importBlock()` by `newPayload` RPC
requests the `FC` module layout might differ when re-visiting for
importing blocks.
* Update logging and docu
details:
Reduce some logging noise
Clarify activating/suspending syncer in log messages
`updateOk` is obsolete and always set to true - callers should not have
to care about this detail
also take the opportunity to clean up storage root naming
* Log/trace cancellation events in scheduler
* Provide `clear()` functions for explicitly flushing data objects
* Renaming header cache functions
why:
More systematic, all functions start with prefix `dbHeader`
* Remove `danglingParent` from layout
why:
Already provided by header cache
* Remove `couplerHash` and `headHash` from layout
why:
No need to cache, `headHash` is unused and `couplerHash` used typically
once, only.
* Remove `lastLayout` from sync descriptor
why:
No need to compare changes, saving is always triggered after actively
changing the sync layout state
* Early reject unsuitable head + finalised header from CL
why:
The finalised header is only passed by its hash so the header must be
fetched somewhere, e.g. from a peer via eth/xx.
Also, finalised headers earlier than the `base` from `FC` cannot be
handled due to the `Aristo` single state database architecture.
Luckily, on a full node, the complete block history is available so
unsuitable finalised headers are stored there already which is exploited
here to avoid unnecessary network traffic.
* Code cosmetics, remove cruft, prettify logging, remove `final` metrics
detail:
The `final` layout parameter will be deprecated and later removed
* Update/re-calibrate syncer logic documentation
why:
The current implementation sucks if the `FC` module changes the
canonical branch in the middle of completing a header chain (due
to concurrent updates by the `newPayload()` logic.)
* Implement according to re-calibrated syncer docu
details:
The implementation employs the notion of named layout states (see
`SyncLayoutState` in `worker_desc.nim`) which are derived from the
state parameter triple `(C,D,H)` as described in `README.md`.
When walking AriVtx, parsing integers and nibbles actually becomes a
hotspot - these trivial changes reduces CPU usage during initial key
cache computation by ~15%.
Currently, computed hash keys are stored in a separate column family
with respect to the MPT data they're generated from - this has several
disadvantages:
* A lot of space is wasted because the lookup key (`RootedVertexID`) is
repeated in both tables - this is 30% of the `AriKey` content!
* rocksdb must maintain in-memory bloom filters and LRU caches for said
keys, doubling its "minimal efficient cache size"
* An extra disk traversal must be made to check for existence of cached
hash key
* Doubles the amount of files on disk due to each column family being
its own set of files
Here, the two CFs are joined such that both key and data is stored in
`AriVtx`. This means:
* we save ~30% disk space on repeated lookup keys
* we save ~2gb of memory overhead that can be used to cache data instead
of indices
* we can skip storing hash keys for MPT leaf nodes - these are trivial
to compute and waste a lot of space - previously they had to present in
the `AriKey` CF to avoid having to look in two tables on the happy path.
* There is a small increase in write amplification because when a hash
value is updated for a branch node, we must write both key and branch
data - previously we would write only the key
* There's a small shift in CPU usage - instead of performing lookups in
the database, hashes for leaf nodes are (re)-computed on the fly
* We can return to slightly smaller on-disk SST files since there's
fewer of them, which should reduce disk traffic a bit
Internally, there are also other advantages:
* when clearing keys, we no longer have to store a zero hash in memory -
instead, we deduce staleness of the cached key from the presence of an
updated VertexRef - this saves ~1gb of mem overhead during import
* hash key cache becomes dedicated to branch keys since leaf keys are no
longer stored in memory, reducing churn
* key computation is a lot faster thanks to the skipped second disk
traversal - a key computation for mainnet can be completed in 11 hours
instead of ~2 days (!) thanks to better cache usage and less read
amplification - with additional improvements to the on-disk format, we
can probably get rid of the initial full traversal method of seeding the
key cache on first start after import
All in all, this PR reduces the size of a mainnet database from 160gb to
110gb and the peak memory footprint during import by ~1-2gb.
* Fixes related to Prague execution requests
Turn out the specs are changed:
- WITHDRAWAL_REQUEST_ADDRESS -> WITHDRAWAL_QUEUE_ADDRESS
- CONSOLIDATION_REQUEST_ADDRESS -> CONSOLIDATION_QUEUE_ADDRESS
- DEPOSIT_CONTRACT_ADDRESS -> only mainnet
- depositContractAddress can be configurable
Also fix bugs related to t8n tool
* Fix for evmc
* Feature: User configurable extraData when assemble a block
As evident from https://holesky.beaconcha.in/block/2657016
when nimbus-eth1 assemble a block, the extraData field is empty.
This commit will give user a chance to put his extraData or
use default value.
* Warning if extraData exceeds 32 bytes limit
* Add missing comma
* Annotate `async` functions for non-exception tracking at compile time
details:
This also requires some additional try/except catching in the function
bodies.
* Update sync logic docu to what is to be updated
why:
The understanding of details of how to accommodate for merging
sub-chains of blocks or headers have changed. Some previous set-ups
are outright wrong.
This kind of data is not used except in tests where it is used only to
create databases that don't match actual usage of aristo.
Removing simplifies future optimizations that can focus on processing
specific leaf types more efficiently.
A casualty of this removal is some test code as well as some proof
generation code that is unused - on the surface, it looks like it should
be possible to port both of these to the more specific data types -
doing so would ensure that a database written by one part of the
codebase can interact with the other - as it stands, there is confusion
on this point since using the proof generation code will result in a
database of a shape that is incompatible with the rest of eth1.
* Clear rejected sync target so that it would not be processed again
* Use in-memory table to stash headers after FCU import has started
why:
After block imported has started, there is no way to save/stash block
headers persistently. The FCU handlers always maintain a positive
transaction level and in some instances the current transaction is
flushed and re-opened.
This patch fixes an exception thrown when a block header has gone
missing.
* When resuming sync, delete stale headers and state
why:
Deleting headers saves some persistent space that would get lost
otherwise. Deleting the state after resuming prevents from race
conditions.
* On clean start hibernate sync `deamon` entity before first update from CL
details:
Only reduces services are running
* accept FCU from CL
* fetch finalised header after accepting FCY (provides hash only)
* Improve text/meaning of some log messages
* Revisit error handling for useless peers
why:
A peer is abandoned from if the error score is too high. This was not
properly handled for some fringe case when the error was detected at
staging time but fetching via eth/xx was ok.
* Clarify `break` meaning by using labelled `break` statements
* Fix action how to commit when sync target has been reached
why:
The sync target block number might precede than latest FCU block number.
This happens when the engine API squeezes in some request to execute
and import subsequent blocks.
This patch fixes and assert thrown when after reaching target the latest
FCU block number is higher than the expected target block number.
* Update TODO list
* switch to Nim v2.0.12
* fix LruCache capitalization for styleCheck
* KzgProof/KzgCommitment for styleCheck
* TxEip4844 for styleCheck
* styleCheck issues in nimbus/beacon/payload_conv.nim
* ENode for styleCheck
* isOk for styleCheck
* some more styleCheck fixes
* more styleCheck fixes
---------
Co-authored-by: jangko <jangko128@gmail.com>
andri lim
Jordan Hrycaj
Jacek Sieka
tersec
Advaita Saha