MIP-8: Page-ified Storage State 💬🔗

Abstract

We introduce key locality to the Merkle Patricia Trie by adding a page abstraction to the state model, enabling page-level access and warm SLOAD/SSTORE cost for any slot within a loaded page.

Motivation

The EVM abstracts storage as 32-byte {slot, value} pairs. The gas schedule of this model is tied to the commitment scheme of the Merkle Patricia Trie, since the trie acts on these pairs. This creates a dilemma: mapping the MPT to disk causes access to a 32-byte slot to require loading an entire 4KB page, while optimizing the physical disk layout independently leaves the commitment layer bound to the original slot-based pricing model.

In either case, the inefficiency is propagated by the application layer and the state layer. At the application layer, high-level languages such as Solidity rely heavily on keccak256 hashing for mapping layouts. This causes related data to be assigned to pseudorandom storage locations. At the state layer, the MPT hashes keys before commitment, so sequential slot updates modify disjoint regions of the trie. These factors cause logically contiguous slots to be scattered across disjoint pages, resulting in related data being charged as independent disk reads.

To address this, we introduce a page abstraction to the state model. A page is a fixed-size contiguous group of EVM slots. Pages become the atomic unit for both disk I/O and MPT commitments. Once a page is loaded, subsequent SLOAD and SSTORE operations on slots within that page are treated as warm. The trie then commits {page_index, page} pairs.

Standard EVM execution semantics and backward compatibility with existing gas pricing are preserved. Common storage patterns in Solidity naturally benefit from page warming. For example, mappings to structs benefit because a struct’s internal fields occupy contiguous storage slots once the mapping entry is resolved. This preserves existing smart contract development best practices while incentivizing contiguous storage grouping.

Specification

We introduce the following notation:

• Storage slots are 32 byte values.
• EVM words are 32 byte values as defined in the Ethereum Yellow Paper.
• EVM pages are 4096 bytes and composed of 128 words.

For a given slot, we determine its grouping by stripping the lower 7 bits of the key. This stratifies the key space and lets us define a page as a contiguous vector of 128 EVM words. Each key maps to (page_index, offset_within_page), where a page stores 128 consecutive EVM words. The mapping functions from slot to page information are defined as follows:

• page_index(slot) = slot >> 7
• offset(slot) = slot & 0x7F

Page Commitment Function

BLAKE3 supports inclusion proofs at the 1024-byte leaf granularity since internally it constructs a Merkle Tree over 1024-byte chunks. However, efficient single-word inclusion proofs are not natively supported.

To recover this property, we define a commitment function that computes a 32-byte Merkle root over a 4096-byte page by constructing an induced subtree using BLAKE3. This commitment function, referred to as the Induced Subtree Merkle Commit (ISMC), commits only to the occupied state.

Let P be a 4096-byte page. Then note the following:

1. The BLAKE3 compression function operates on 64-byte blocks.
2. The page is partitioned into 64 pair-leaves where each leaf consists of two 32-byte words. Pair-leaf occupancy is tracked via a 64-bit bitmap, while a 128-bit slot bitmap is used for the commitment.
3. Internal nodes form an induced subtree determined by occupancy of pair-leaves, topologically bypassing empty branches entirely. Singletons are carried up the tree without requiring empty hash operations.
4. The commit is done in two phases:
   1. Merge Phase: A bottom-up reduction of the occupied pair-leaves. This captures the payload of all active data in the page.
   2. Seal Phase: The resulting subtree root is hashed alongside the 128-bit slot bitmap. This uniquely binds the data to the exact geometric positions and prevents spatial collisions.
5. Execution and proof size scale with occupancy. The merge phase costs exactly k - 1 compressions, where k is the number of active pairs.

The resulting root is the page commitment. A Python pseudocode implementation of this commitment is shown below. A full breakdown of this commitment function can be found in the paper titled Merkle Commitments via Induced Subtrees.

Reference implementation

Function ISMC_Commit(page, slot_bitmap):
    // Inputs:
    // page: 4096-byte array (64 pairs of 64 bytes)
    // slot_bitmap: 128-bit integer representing exact 32-byte word occupancy
    
    // Assume non-empty page
    Assert slot_bitmap != 0

    // Convert 128-bit slot bitmap to 64-bit pair bitmap (1 if either word in pair is active)
    pair_bitmap = reduce_to_pair_bitmap(slot_bitmap)

    // Domain-separated leaf IV. Derived once from the constant 32-byte
    // domain string and used to compress every active pair-leaf to 32
    // bytes, separating the leaf domain from the parent domain.
    PAIR_LEAF_DOMAIN = "ultra_merkle_pair_leaf_domain___"   // 32 bytes
    LEAF_IV = BLAKE3_compress(state=IV,
                              block=PAIR_LEAF_DOMAIN || zeros(32),
                              block_len=64,
                              counter=0,
                              flags=DERIVE_KEY_MATERIAL)
    
    // --- Phase 1: Data Merge Phase ---
    active_nodes = []
    
    // Extract only occupied pair-leaves (Bypassing empty branches)
    For i from 0 to 63:
        If bit i is set in pair_bitmap:
            pair_data = page[i * 64 : (i + 1) * 64]
            // Reduce each 64-byte pair-leaf to 32 bytes via one bare
            // compression with LEAF_IV and DERIVE_KEY_MATERIAL.
            leaf_hash = BLAKE3_compress(LEAF_IV, pair_data,
                                        block_len=64, counter=0,
                                        flags=DERIVE_KEY_MATERIAL)
            active_nodes.append({ index: i, value: leaf_hash })
            
    // Bottom-up reduction 
    For level from 0 to 5:
        next_level_nodes = []
        i = 0
        
        While i < length(active_nodes):
            current_node = active_nodes[i]
            
            // Check if a right sibling exists in the active nodes
            If i + 1 < length(active_nodes):
                next_node = active_nodes[i + 1]
                
                // Nodes are siblings if they share the same parent at the next level
                If (current_node.index >> (level + 1)) == (next_node.index >> (level + 1)):
                    // Hash the two 32-byte children into a new 32-byte
                    // parent using ONE bare compression (NOT the full
                    // BLAKE3_Hash pipeline) with CHUNK_START|CHUNK_END.
                    parent_value = BLAKE3_compress(IV,
                                                   current_node.value || next_node.value,
                                                   block_len=64, counter=0,
                                                   flags=CHUNK_START | CHUNK_END)
                    next_level_nodes.append({ index: current_node.index, value: parent_value })
                    i += 2
                    continue
            
            // Singleton Case: Carry up without hashing
            next_level_nodes.append(current_node)
            i += 1
            
        active_nodes = next_level_nodes
        
        // Early exit: The tree is fully reduced to a single root
        If length(active_nodes) == 1:
            break
            
    subtree_root = active_nodes[0].value
    
    // --- Phase 2: Structural Seal Phase ---
    // Uniquely bind the subtree root to the exact geometric layout
    slot_bitmap_le_16B = to_little_endian_bytes(slot_bitmap, 16)
    seal_payload = concatenate(slot_bitmap_le_16B, subtree_root)  // 16 bytes + 32 bytes
    page_commitment = BLAKE3_Hash(seal_payload)  // unkeyed
    
    Return page_commitment

Inclusion Proofs

Intuitively, the ISMC can be viewed as an embedded Merkle tree that proves the exact state of a 4096-byte page. Given a page commitment, we can efficiently prove the inclusion of any specific 32-byte word within that page.

To construct an inclusion proof for a particular word, the verifier must be able to recompute the page commitment using the merge schedule. Therefore, an ISMC inclusion proof consists of exactly two components:

1. The 128-bit slot bitmap: Required to deterministically reconstruct the tree’s geometry and prove the exact spatial index of the word.
2. The sibling hashes: The minimal set of sibling hashes required to route from the target word to the subtree root under the induced merge schedule.

The inclusion proof size scales strictly with the occupancy of the page rather than its physical size. Let k be the number of active leaves; the maximum tree depth is 6. The number of sibling hashes along a leaf’s path is at most min(k - 1, 6). Therefore, the worst-case inclusion proof size for a word is strictly bounded by min(k - 1, 6) * 32 bytes + 16 bytes.

Leaves of Merkle-Patricia Trie

The Merkle Patricia Trie commits to {page_index_i: page_commit(page_i)} pairs where page_commit(page_i) is a 32-byte commitment to the contents of a page.

This trie has the following modifications:

1. Hash Function: Keccak.
2. Leaf values: For each page_index, the corresponding leaf value is the RLP-string framing of the 32-byte page commitment, i.e. RLP_encode_string(page_commit(page_i)) = 0xa0 || page_commit(page_i) (33 bytes). The MPT leaf node then RLP-encodes this byte string when constructing the leaf RLP, matching how a standard MPT storage leaf nests an RLP-encoded U256 value.
3. Leaf placement: Each page_index uniquely determines a path from the MPT root to its leaf. This path is computed exactly as in a standard MPT, using the page_index as the key.
4. Trie structure: The MPT structure is otherwise unchanged: branch, extension, and leaf nodes follow the standard MPT rules.
5. On-demand computation: The value of each storage leaf is exactly 32 bytes, so page_commit(page) can be recomputed from the page contents whenever needed. No additional storage layout changes are required.
6. Merkle Proofs: Merkle proofs for page commitments are unchanged from a standard MPT. Such a proof only proves that a particular page has been committed.

As a result, the inclusion proof for any individual word consists of two components: the inclusion proof of the word within its page commitment, and the inclusion proof of the page commitment within the MPT. The total proof size is the sum of these components.

Gas Cost

We assume the following:

1. Let read_accessed_pages be the set of read pages accessed during the current transaction;
2. Let write_accessed_pages be the set of write pages accessed during the current transaction;
3. and let p = page_index(s).
4. BASE_COST is 100 gas;
5. LOAD_COST is 8000 gas;
6. WRITE_COST is 2800 gas;
7. STATE_GROWTH_COST is 17000 gas.

SLOAD Gas Schedule

We define the SLOAD cost in terms of pages as the following:

# Page is cached then charge base cost. 
if p in read_accessed_pages: 
    gas_deducted += BASE_COST
# Page is not cached charge load cost.
else: 
    gas_deducted += LOAD_COST + BASE_COST
    read_accessed_pages.append(p)

SSTORE Gas Schedule

The SSTORE cost can be stratified in terms of I/O cost and state transitions costs. The I/O cost is defined on the level of page granularity, while the state transition cost is defined in terms of SSTORE granularity with respect to a page. However, the I/O remains aware of whether that data acted upon is cold or hot.

Finally, as in legacy SSTORE, we apply the LOAD_COST to a page to check the initial value.

Write Cost

Let P0 be the initial value of page p for a given SSTORE, and let P1 be the terminal value of page p immediately after the SSTORE. Apriori the write cost, a load cost is applied to obtain the initial value P0 of the page.

The following is the I/O cost for the writing the page to the hardware.

# PAGE I/O Cost


# `BASE_COST` is deducted in all cases.
gas_deducted += BASE_COST

# `LOAD_COST` is deducted to obtain initial state P0 from DB
if p not in read_accessed_pages: 
    gas_deducted += LOAD_COST
    read_accessed_pages.append(p)

# Page did not change for this SSTORE
if P0 == P1:
    gas_deducted += 0

# Page did change for this SSTORE
else:
	# Page already charged write
	if p in write_accessed_pages:
        gas_deducted += 0

	# Page charged first write only
	else:
        gas_deducted += WRITE_COST

        # Page has been charged write cost
        write_accessed_pages.append(p)

        # instantiate state growth counters
        current_state_growth[p] = 0
        net_state_growth[p] = 0  
        
    

State Transition Cost

The remainder of the SSTORE cost is computed based on the net effect of state growth. The state growth cost is only deducted if the transaction increases the net state of the page. If a slot is created to replace a previously cleared slot in the same page, the growth fee is bypassed. This is defined so that gas remaining is monotonically decreasing, aligning with the current gas model’s assumptions. These costs are defined per page; there is no cross-page subsidization.

# State Transition Cost

# add to current state counter growth if page state increases
if v_current == 0 and v_new != 0:
	current_state_growth[p] += 1
	
# subtract state growth counter if page state decreases
elif v_current != 0 and v_new == 0:
    current_state_growth[p] -= 1
    
# if net state growth has increased then charge for state growth
if current_state_growth[p] > net_state_growth[p] :
	  gas_deducted += STATE_GROWTH_COST
	  net_state_growth[p]  = current_state_growth[p]

During execution, if a call reverts, the counters current_state_growth and net_state_growth as well as sets read_accessed_pages and write_accessed_pages must revert to their values from before that call to maintain price consistency.

Rationale

Contracts that allocate storage in contiguous chunks aligned to page boundaries are economically optimal, benefiting from lower gas costs and highly efficient inclusion proofs. Because the page commitment execution and proof size scale with the number of active pairs, the architecture natively aligns with the EVM’s storage patterns:

1. Random Sparse State: The probability of two randomly hashed keys colliding within the same page is approximately 1 in 2**249. A standard mapping slot is therefore likely to be the only populated element in its page, and its page commitment can be reconstructed with zero sibling hashes. Proof sizes for current mapping-based states remain stable outside of the bitmap overhead.
2. Contiguous State: When a page contains a densely packed, contiguous set of words, a multi-word inclusion requires only the sibling hashes along the outer boundary of the data block. This amortizes the proof size per word, making contiguous multi-word inclusion proofs strictly more efficient, again outside of the bitmap overhead.
3. Amortized Sparse Reads: When a page is sparsely populated at random, single-word inclusion proofs incur a small, bounded overhead within the page. Under a uniform distribution, the expected proof size grows logarithmically as O(log k).

BLAKE3 was chosen for its hashing speed, amenability to zk proof generation, and the BAO construction. This allows for faster merklization in both the standard case and proof generation. Applying BLAKE3 to the entire Merkle tree also enables bytecode inclusion proofs via the BAO construction.

Backwards Compatibility

The EVM semantics remain unchanged under this update. The only modification is the introduction of page-level access warming to the gas schedule.

Existing contracts that access consecutive storage slots will automatically observe reduced gas costs. This update does not require developers to adopt bespoke storage architectures or non-standard upgrade patterns to realize benefits:

• No Penalty for Dispersed State: Existing hashed patterns and dispersed state layouts are not penalized; they simply maintain their historical baseline cost. For example, reading a standard mapping(address => Struct) will execute the initial mapping lookup at the baseline gas cost. However, all subsequent reads to that specific user’s struct fields will benefit from the new warm-page gas discounts.
• Solidity: Standard Solidity features natively allocate data in consecutive slots. Common primitives such as structs, densely packed state variables, and arrays will seamlessly inherit these gas optimizations without developer intervention.
• Unaligned Legacy Layouts: Conventional upgradeable contract patterns may not perfectly align with 128-word page boundaries. While developers of future contracts may choose to hyper-optimize layouts to capture maximal page-warming discounts, failing to do so incurs no penalty. Misaligned or “cold” reads across page boundaries simply execute at the standard baseline cost.

The only class of contracts impacted by this update are those that explicitly rely on hardcoded opcode gas costs associated with storage accesses. All other contracts remain functionally unchanged.

EIP-2930 Access Lists

The transaction payload format for EIP-2930 access lists is backwards compatible. If an access list contains multiple keys that map to the same 128-word page then the cold-access cost is charged only once and applies the warm-access cost to all subsequent keys within that boundary.

RPC Modifications

1. The RPC method eth_getProof must be updated to return the modified proof structure.
2. The RPC method eth_createAccessList must be updated as above to return an updated gasUsed estimate.
3. eth_estimateGas, eth_call, and trace_call should reflect the updated gas schedule.

Security Considerations

Page Index Space Size

The current Merkle Patricia Trie uses a 2256 key space, with keys hashed to determine leaf placement so that the tree remains balanced. Under the paged state scheme, the effective key space is reduced to 2249. This reduction does not affect the tree structure: the hash still forces a uniform distribution, so the MPT topology and security properties are preserved.

Page Size

Each leaf of the current Merkle Patricia Trie corresponds to a single EVM storage slot. We considered 2, 4, 8, 16, 32, 64, and 128 words per page. Each of these page sizes is at most 4096 bytes of raw slot data, so they fit within an I/O page (ignoring any node metadata overhead).

A storage page may span multiple I/O pages. We can estimate the probability that a storage page crosses an I/O page boundary using uniform random offsets (assuming the storage page is completely full):

When a storage page straddles multiple I/O pages, a single EVM SSTORE/SLOAD can underprice storage operations due to read amplification. In practice, recent storage is cached, so these effects are usually mitigated.

To reason about the worst case, consider a single block of EVM execution in which an attacker controls all storage writes. If storage pages cross I/O boundaries, SLOAD operations for misaligned portions could be effectively 2× slower. To achieve this, an attacker would need to allocate an entire page and then wait until the relevant pages are no longer cached.

Related Prior Art

It should be noted that EIP-7864 introduces a similar page-structure property by grouping 256 slots into structured subtrees. However, this localization is achieved as a secondary side effect of fundamentally restructuring the entire state commitment tree with its costs defined by the EIP-4762 gas schedule.

Future Directions

In a future MIP, we explore the correspondence between binary commitments and high-fanout trees to further reduce expected proof size and minimize merklization complexity.

Copyright

Copyright and related rights waived via CC0.