A backend interface framework development method and system

Abstract

This invention relates to the field of electronic digital data processing technology, and discloses a backend interface framework development method and system, including: acquiring a raw byte stream to be processed that follows a unified input model; retrieving the static offset of the target key in a contiguous memory block of the target data structure based on a static offset routing table pre-generated during the system compilation phase; calculating the target physical memory offset address by accumulating the starting physical base address and the static offset; and scheduling the memory management unit to write the target value in the raw byte stream to be processed into the target physical memory offset address. This invention utilizes a hardware base address plus offset shift addressing mechanism to bypass the hash comparison and reflection detection process in conventional frameworks, reduce the dynamic allocation overhead of intermediate parsing objects, reduce processor clock cycle loss, suppress memory oscillations caused by the generation of large-scale redundant objects, eliminate garbage collection pauses, and ensure deterministic throughput performance under high-concurrency heterogeneous data requests.

Description

Technical Field

[0001] This invention belongs to the field of electronic digital data processing technology, and in particular relates to a back-end interface framework development method and system. Background Technology

[0002] In the current field of electrical digital data processing, the backend interface framework is used to map external heterogeneous signals into business execution contexts. By defining standardized communication protocols and data structures, it achieves decoupling and integration between business modules. Current technology uses generic key-value pair structures to encapsulate request parameters to achieve compatibility of the interface when dealing with different business models.

[0003] This highly standardized design path incurs physical performance costs. When external byte streams enter the processing pipeline, the deserialization processing unit cannot determine the specific data structure boundaries at compile time. During runtime, the processor performs repeated hash comparisons, reflection probing, and dynamic memory block reallocation for the incoming data. The dense dynamic type resolution mechanism causes branch prediction failures in the processor instruction pipeline and generates cache misses, resulting in real-time computing power costs while maintaining protocol universality. To alleviate these contradictions, the industry has attempted to use high-performance deserialization libraries or build object pools to reduce overhead. However, such improvements apply to application layer logic and do not involve data destructuring and memory binding. Existing technologies mainly have the following shortcomings: 1. Protocol adaptation lags behind the arrival time of data, resulting in processing latency in high-concurrency environments; 2. The generic data destructuring process generates temporary objects, causing oscillations in the memory heap space and resulting in garbage collection pauses.

[0004] Therefore, how to construct a static offset routing table based on pre-compiled topology detection and combine it with in-situ memory addressing logic to eliminate dynamic resolution loss in the generic data flow process has become the technical problem to be solved by this invention. Summary of the Invention

[0005] This invention provides a backend interface framework development method, comprising the following steps:

[0006] Step S101: Obtain the raw byte stream to be processed. The raw byte stream to be processed follows a unified input model. The unified input model limits the key-value pair attributes, request page identifier, and sorting vector in the generic parameter list through a preset byte alignment rule. The raw byte stream to be processed is presented as a continuous binary message sequence in the physical carrier.

[0007] Step S102: Extract the attribute identifier of the target key from the original byte stream to be processed, and use the attribute identifier as a key index to perform a conflict-free lookup and matching in the static offset routing table loaded in the system kernel buffer to obtain the static offset of the target key in the contiguous memory block of the target data structure relative to the starting physical base address. The static offset routing table is pre-built during the system compilation stage by parsing the metadata description file of the target data structure to establish a deterministic mapping relationship between the attribute identifier and the physical memory space displacement, so as to ensure that each business field corresponds to a unique memory space offset indicator.

[0008] Step S103: The starting physical base address and the static offset are accumulated by addition arithmetic operations to determine the target physical memory offset address corresponding to the target key. The memory management unit is then scheduled to lock the base addressing vector of the target data structure in the heap memory. The target value data in the raw byte stream to be processed is directly written into the physical storage unit corresponding to the target data structure according to the target physical memory offset address. This bypasses the string hash dynamic comparison logic, the type detection logic in the reflection mechanism, and the dynamic memory allocation procedure of the intermediate dictionary parsing object in the conventional development framework for the raw byte stream to be processed by the shift addressing operation at the physical addressing level.

[0009] Preferably, the construction process of the static offset routing table in step S102 includes: step S1021, parsing the entity description file of the backend business system, extracting the atomic attribute identifiers of each business field and the byte length occupied by each attribute in physical memory, and establishing an association mapping record between the attribute identifier and the byte length; step S1022, according to the declaration order of the business fields in the entity description file and the byte length, calculating the cumulative displacement of each business field relative to the starting position in the continuous memory block of the target data structure, determining the memory offset interval of each field according to the cumulative displacement, encapsulating the atomic attribute identifier and the corresponding memory offset interval into a static routing entry with a key-value mapping relationship and persistently storing it in a read-only memory buffer.

[0010] Preferably, the method further includes: step S104, quantizing the interface protocol description file into atomic metadata nodes, and generating a logical mapping matrix based on the metadata nodes, wherein the logical mapping matrix records the linear transformation logic between interface fields and business fields; step S105, obtaining the atomic data transformation operator coupled with the logical mapping matrix, and injecting the atomic data transformation operator into the data transformation pipeline, so as to complete the logical decoupling between the interface protocol layer and the business logic layer by using mathematical transformation paths, and ensuring that changes in the interface protocol only trigger the parameter adjustment of the logical mapping matrix.

[0011] Preferably, when a change in the interface protocol description file is detected during system operation, the method further includes: step S106, performing an incremental update of the logical mapping matrix. This incremental update determines the affected mapping path by comparing the differences between the metadata nodes before and after the change, and reloads the transformation instruction set corresponding to the changed path in memory, so as to realize the business reload of the system without recompiling and without downtime, and ensure the continuity of the electronic digital data processing system's response to external requests.

[0012] Preferably, the process of writing the target value in step S103 includes: step S1031, intercepting intermediate object instantiation requests in the deserialization pipeline to block the allocation of intermediate redundant objects in the heap memory; step S1032, locating the contiguous memory space allocated by the target data structure in the heap memory, and directly injecting the binary data in the original byte stream into the contiguous memory space according to the target physical memory offset address, so that the business parameters in the original byte stream are directly converted into the memory image state of the business entity, avoiding data copying loss in the traditional parsing process.

[0013] Preferably, after completing the in-situ memory overwrite, the method further includes: step S107, monitoring the fragmentation index of the heap memory and the garbage collection pause time, the fragmentation index reflecting the success rate of allocation of contiguous memory space; step S108, when the garbage collection pause time exceeds a preset time threshold of 30ms, starting the memory management unit to perform memory alignment rule verification, by adjusting the physical start boundary of the data segment, so that the write address of each business field conforms to the processor's word length constraint, so as to suppress the memory space pressure caused by the generation of large-scale intermediate objects.

[0014] Preferably, the table lookup matching process in step S102 includes: step S1023, calculating the hash fingerprint corresponding to the identifier of the target key, which is used to convert the variable-length string identifier into a fixed-length numerical digest; step S1024, retrieving a constant entry that matches the hash fingerprint from the static offset routing table, and using the address index of the constant entry to determine the address mapping result of the offset, so as to ensure that the time complexity of address retrieval remains at a constant level when processing high-concurrency requests, thereby reducing processor clock cycle loss.

[0015] Preferably, the generic parameter list in the unified input model carries heterogeneous business parameters through a list structure. This list structure occupies a header field of a preset length in the physical message, and the static offset routing table assigns a unique addressing path to each set of preset parameter pairs in the generic parameter list. This addressing path is fixed in the hash bucket structure of the routing table through static hard coding to eliminate the type inference overhead caused by dynamic parsing of generic parameters at runtime. After step S101, the method further includes: step S1011, identifying the request priority identifier in the raw byte stream to be processed. The request priority identifier is encoded in the feature bits of the message header of the byte stream; step S1012, when the request priority identifier represents a high-concurrency digital signal request, scheduling the raw byte stream to be processed into the zero-reflection processing pipeline, and shortening the residence time of a single request in the processor core by forcibly executing in-situ memory overwrite logic, thereby improving the overall throughput of the system.

[0016] A backend interface framework development system, comprising:

[0017] The data acquisition module is used to acquire the raw byte stream to be processed that follows a unified input model, and when it detects that the request priority identifier in the raw byte stream to be processed represents a high-concurrency digital signal request, it locks it into the zero-reflection processing pipeline.

[0018] The address interpretation module is connected to the static offset routing table pre-stored in the system kernel buffer. It is used to extract the attribute identifier of the target key in the raw byte stream to be processed and perform a conflict-free table lookup match to obtain the static offset of the target key relative to the starting physical base address in the contiguous memory block of the target data structure.

[0019] The in-situ storage module is used to accumulate the starting physical base address and the static offset to determine the target physical memory offset address, and to schedule the memory management unit to lock the addressing vector of the target data structure in the heap memory, and inject the target value in the raw byte stream to be processed into the physical storage unit corresponding to the target data structure according to the target physical memory offset address.

[0020] Compared with existing technologies, the backend interface framework development method of this invention has the following advantages:

[0021] 1. In the development of the backend interface framework, the linkage between the abstract syntax tree detection in the pre-compilation stage and the static offset routing table at runtime eliminates the dynamic type resolution overhead of the general interface protocol when processing generic data streams. When an external digital signal request arrives, the processor directly extracts the identifier of the corresponding key value in the input byte stream according to the static offset routing table and calculates the base address offset in the contiguous memory block of the target business entity. This process transforms the dynamic parsing path that relies on string hash comparison and reflection detection in traditional technology into arithmetic operations based on deterministic physical addresses, which greatly reduces the processor clock cycle loss during data flow and ensures the deterministic throughput performance of the system when processing high-frequency heterogeneous data requests.

[0022] 2. By coupling the logical mapping matrix with atomic data transformation operators, this invention achieves deep decoupling between the protocol layer and the business logic layer and continuous availability of the system in runtime. The invention quantizes the interface protocol description file into atomic metadata nodes and generates a logical mapping matrix accordingly. When the system faces changes in the interface protocol or expansion of the business model dimension, it only needs to trigger an incremental update of the logical mapping matrix and reload the conversion instruction set in memory. There is no need to recompile or shut down and restart the business kernel. This approach effectively bypasses the architectural oscillations caused by hard-coded conversion logic in existing technologies and improves the evolutionary flexibility and maintenance efficiency of the electronic digital data processing system in dynamic business environments.

[0023] 3. Through the synergistic effect of the zero-reflection in-situ memory direct write mechanism and the underlying memory alignment rules, the memory space pressure and garbage collection pauses caused by the generation of large-scale intermediate objects are suppressed. In the data mapping stage, the processor intercepts the conventional deserialization pipeline and directly writes the original data in the input byte stream in-situ according to the calculated physical memory offset address, avoiding the instantiation of temporary collection objects or generic lists with no business value. This fine-grained scheduling at the memory addressing level reduces the fragmentation of heap memory, reduces systemic pauses caused by dynamic memory reallocation, and ensures the execution stability of high-performance electronic digital data processing tasks. Attached Figure Description

[0024] Figure 1 This is a flowchart of the interface processing method for static routing and in-situ memory addressing of the present invention;

[0025] Figure 2 This is a system architecture evolution diagram that integrates automation toolchains and specification definitions in this invention. Detailed Implementation

[0026] The technical solutions of the embodiments of this application will be clearly described below with reference to the accompanying drawings. Obviously, the described embodiments are only some embodiments of this application, not all embodiments. All other embodiments obtained by those skilled in the art based on the embodiments of this application are within the scope of protection of this application.

[0027] In the description of this specification, references to the terms "an embodiment," "some embodiments," "illustrative embodiments," "examples," "specific examples," or "some examples," etc., indicate that a specific feature, structure, material, or characteristic described in connection with that embodiment or example is included in at least one embodiment or example of the present invention. In this specification, the illustrative expressions of the above terms do not necessarily refer to the same embodiment or example, and the specific features, structures, materials, or characteristics described may be combined in any suitable manner in one or more embodiments or examples.

[0028] A backend interface framework development method includes the following steps:

[0029] Step S101: Obtain the raw byte stream to be processed. The raw byte stream to be processed follows a unified input model. The unified input model limits the key-value pair attributes, request page identifier, and sorting vector in the generic parameter list through a preset byte alignment rule. The raw byte stream to be processed is presented as a continuous binary message sequence in the physical carrier.

[0030] Step S102: Extract the attribute identifier of the target key from the original byte stream to be processed, and use the attribute identifier as a key index to perform a conflict-free lookup and matching in the static offset routing table loaded in the system kernel buffer to obtain the static offset of the target key in the contiguous memory block of the target data structure relative to the starting physical base address. The static offset routing table is pre-built during the system compilation stage by parsing the metadata description file of the target data structure to establish a deterministic mapping relationship between the attribute identifier and the physical memory space displacement, so as to ensure that each business field corresponds to a unique memory space offset indicator.

[0031] Step S103: The starting physical base address and the static offset are accumulated by addition arithmetic operations to determine the target physical memory offset address corresponding to the target key. The memory management unit is then scheduled to lock the base addressing vector of the target data structure in the heap memory. The target value data in the raw byte stream to be processed is directly written into the physical storage unit corresponding to the target data structure according to the target physical memory offset address. This bypasses the string hash dynamic comparison logic, the type detection logic in the reflection mechanism, and the dynamic memory allocation procedure of the intermediate dictionary parsing object in the conventional development framework for the raw byte stream to be processed by the shift addressing operation at the physical addressing level.

[0032] Preferably, the construction process of the static offset routing table in step S102 includes: step S1021, parsing the entity description file of the backend business system, extracting the atomic attribute identifiers of each business field and the byte length occupied by each attribute in physical memory, and establishing an association mapping record between the attribute identifier and the byte length; step S1022, according to the declaration order of the business fields in the entity description file and the byte length, calculating the cumulative displacement of each business field relative to the starting position in the continuous memory block of the target data structure, determining the memory offset interval of each field according to the cumulative displacement, encapsulating the atomic attribute identifier and the corresponding memory offset interval into a static routing entry with a key-value mapping relationship and persistently storing it in a read-only memory buffer.

[0033] Preferably, the method further includes: step S104, quantizing the interface protocol description file into atomic metadata nodes, and generating a logical mapping matrix based on the metadata nodes, wherein the logical mapping matrix records the linear transformation logic between interface fields and business fields; step S105, obtaining the atomic data transformation operator coupled with the logical mapping matrix, and injecting the atomic data transformation operator into the data transformation pipeline, so as to complete the logical decoupling between the interface protocol layer and the business logic layer by using mathematical transformation paths, and ensuring that changes in the interface protocol only trigger the parameter adjustment of the logical mapping matrix.

[0034] Preferably, when a change in the interface protocol description file is detected during system operation, the method further includes: step S106, performing an incremental update of the logical mapping matrix. This incremental update determines the affected mapping path by comparing the differences between the metadata nodes before and after the change, and reloads the transformation instruction set corresponding to the changed path in memory, so as to realize the business reload of the system without recompiling and without downtime, and ensure the continuity of the electronic digital data processing system's response to external requests.

[0035] Preferably, the process of writing the target value in step S103 includes: step S1031, intercepting intermediate object instantiation requests in the deserialization pipeline to block the allocation of intermediate redundant objects in the heap memory; step S1032, locating the contiguous memory space allocated by the target data structure in the heap memory, and directly injecting the binary data in the original byte stream into the contiguous memory space according to the target physical memory offset address, so that the business parameters in the original byte stream are directly converted into the memory image state of the business entity, avoiding data copying loss in the traditional parsing process.

[0036] Preferably, after completing the in-situ memory overwrite, the method further includes: step S107, monitoring the fragmentation index of the heap memory and the garbage collection pause time, the fragmentation index reflecting the success rate of allocation of contiguous memory space; step S108, when the garbage collection pause time exceeds a preset time threshold of 30ms, starting the memory management unit to perform memory alignment rule verification, by adjusting the physical start boundary of the data segment, so that the write address of each business field conforms to the processor's word length constraint, so as to suppress the memory space pressure caused by the generation of large-scale intermediate objects.

[0037] Preferably, the table lookup matching process in step S102 includes: step S1023, calculating the hash fingerprint corresponding to the identifier of the target key, which is used to convert the variable-length string identifier into a fixed-length numerical digest; step S1024, retrieving a constant entry that matches the hash fingerprint from the static offset routing table, and using the address index of the constant entry to determine the address mapping result of the offset, so as to ensure that the time complexity of address retrieval remains at a constant level when processing high-concurrency requests, thereby reducing processor clock cycle loss.

[0038] Preferably, the determination of the target physical memory offset address in step S103 follows the formula below: ,in, The target physical memory offset address, The starting physical base address of the contiguous memory block containing the target data structure. As the static offset corresponding to the target key, this formula achieves zero-reflection positioning of business data through the operation logic of adding the offset to the hardware base address.

[0039] Preferably, the generic parameter list in the unified input model carries heterogeneous business parameters through a list structure. This list structure occupies a header field of a preset length in the physical message, and the static offset routing table assigns a unique addressing path to each set of preset parameter pairs in the generic parameter list. This addressing path is fixed in the hash bucket structure of the routing table through static hard coding to eliminate the type inference overhead caused by dynamic parsing of generic parameters at runtime. After step S101, the method further includes: step S1011, identifying the request priority identifier in the raw byte stream to be processed. The request priority identifier is encoded in the feature bits of the message header of the byte stream; step S1012, when the request priority identifier represents a high-concurrency digital signal request, scheduling the raw byte stream to be processed into the zero-reflection processing pipeline, and shortening the residence time of a single request in the processor core by forcibly executing in-situ memory overwrite logic, thereby improving the overall throughput of the system.

[0040] A backend interface framework development system, comprising:

[0041] The data acquisition module is used to acquire the raw byte stream to be processed that follows a unified input model, and when it detects that the request priority identifier in the raw byte stream to be processed represents a high-concurrency digital signal request, it locks it into the zero-reflection processing pipeline.

[0042] The address interpretation module is connected to the static offset routing table pre-stored in the system kernel buffer. It is used to extract the attribute identifier of the target key in the raw byte stream to be processed and perform a conflict-free table lookup match to obtain the static offset of the target key relative to the starting physical base address in the contiguous memory block of the target data structure.

[0043] The in-situ storage module is used to accumulate the starting physical base address and the static offset to determine the target physical memory offset address, and to schedule the memory management unit to lock the addressing vector of the target data structure in the heap memory, and inject the target value in the raw byte stream to be processed into the physical storage unit corresponding to the target data structure according to the target physical memory offset address.

[0044] Example 1: In a microservice gateway scenario, the system continuously receives raw byte streams following a unified input model. The unified input model is essentially a static topology mapping pattern pre-built during the system compilation phase based on a metadata description file, rather than a random probability model at runtime. It parses the structured metadata of backend business entities, extracts the logical ownership and physical type of each business field, and solidifies them into an immutable binary message template according to a preset linear arrangement rule. This provides a deterministic structural reference for subsequent static addressing. The technical problem the system faces is that when the processor parses a generic parameter list containing key-value pair attributes, the runtime dynamic type resolution and reflection mechanism frequently trigger dynamic memory allocation of intermediate dictionary parsing objects. This memory heap space oscillation exacerbates garbage collection pauses, restricting system data throughput performance. The system parses the metadata description file of the target data structure during the compilation phase, providing... The system retrieves the attribute identifiers and their byte lengths for each business field. In this process, the so-called atomic attribute identifier refers to the smallest indivisible logical unit extracted after the complex entity structure in the business system is deeply flattened. To ensure addressing accuracy in high-concurrency scenarios, each attribute identifier is standardized into a feature vector containing a summary of the field's global logical path and physical type features. This completely deconstructs the business objects in the logical layer into physical storage atoms with clear memory boundaries. This approach eliminates the semantic ambiguity caused by entity nesting or generic wrapping, enabling subsequent offset addressing to directly reach the physical storage unit. The system calculates the cumulative offset and determines the memory offset interval for each business field, generating a static offset routing table that is persistently stored in the system kernel buffer. This routing table establishes a mapping relationship between attribute identifiers and physical memory space offsets, providing the spatial addressing premise for subsequent in-situ data writing.

[0045] When the raw byte stream to be processed enters the processing pipeline, the attribute identifier of the target key in the raw byte stream is extracted. This attribute identifier is then used as a key index to perform a lookup match in the static offset routing table to obtain the static offset of the target key relative to the starting physical base address within the contiguous memory block of the target data structure. The starting physical base address and this static offset are accumulated. The scheduling memory management unit then calculates the target physical memory offset address using the following formula: ,in, This is the target's physical memory offset address, representing the target's absolute location in the heap memory. This represents the starting physical base address of the contiguous memory block containing the target data structure, indicating the absolute position of the starting point for object memory allocation. The static offset corresponding to the target key represents the physical distance of the attribute field relative to the starting physical base address. After calculation, the target value in the original byte stream to be processed is directly written to the target physical memory offset address based on the target physical memory offset address. The system replaces the complex conditional jump branches in the conventional framework with low-level arithmetic shift instructions. Specifically, after receiving the write instruction, the processor does not need to enter the dynamic decision tree of the deserialization engine. Instead, it uses the displacement scalar hard-coded in the static offset routing table to directly complete the in-situ mapping of the data within the memory addressing cycle. This processing method bypasses the hash operation task for the external string, the type checking branch in the runtime state, and the temporary heap memory allocation operation generated with the intermediate dictionary object at the physical level, so that the processor's instruction pipeline maintains linear execution and fundamentally eliminates the computational power loss caused by branch prediction failure or memory oscillation.

[0046] During system initialization, the underlying memory allocation system call is used to request and lock a contiguous virtual massive page memory space in user mode. The starting address pointer of the massive page memory block within the current process's virtual address space is extracted as the starting physical base address in the formula. The hardware memory management unit performs address translation to the underlying physical storage unit according to the system page table. To ensure the linear consistency between user-mode virtual address operations and underlying physical address offsets, the contiguous virtual big page memory space called by the system is configured as the operating system's giant page mode. The system lock instruction forces this segment of virtual memory to reside permanently in the corresponding contiguous physical big page. Since the relative offset of the virtual address and the relative offset of the physical memory are absolutely equivalent within a single physical giant page, the target virtual address obtained by accumulating the virtual starting address pointer and the static offset can be linearly mapped to the corresponding real target physical storage unit when bypassed by the hardware. This opens up the offset addressing closed loop at the physical addressing level at the logical layer.

[0047] Regarding step S103, where the scheduling memory management unit locks the base addressing vector of the target data structure in the heap memory and writes the target value from the original byte stream to be processed to the target physical memory offset address, the original assumption of linear equivalence between virtual and physical addresses may fail when the system is running in a cross-NUMA (Non-Uniform Memory Access) architecture environment, leading to uncontrollable in-situ addressing results. Therefore, this embodiment provides a supplementary implementation, refining the writing process into the following steps to ensure determinism and executability in a multi-node memory system:

[0048] Step A1: Obtain the virtual large page space to be locked, the base address of the target structure memory, and the NUMA node set. Divide the large page space into page units according to page frames, record the node identifier of each page, and count the total number of switching based on the changes in the node identifiers of adjacent pages.

[0049] If the number of switching operations is greater than zero, the corresponding addressing domain will be marked as to be reconstructed, and the initial addressing domain description parameters will be output.

[0050] In another embodiment, step A1 is as follows:

[0051] A1.1: Obtain from the operating system the contiguous virtual large page memory space to be used for in-situ writing, and the starting virtual base address of the contiguous memory block of the target data structure. and read the processor NUMA node set The contiguous virtual massive page memory space is divided into sections at the page frame granularity. Each page unit corresponds to a physical page frame.

[0052] For the Page unit ( The actual NUMA node number it landed on was retrieved from the operating system's page table. And define the node affiliation function: ;

[0053] in Indicates the first The node assignment results for each page unit This is the actual node number.

[0054] This function establishes a deterministic mapping between page units in the virtual address space and physical NUMA nodes.

[0055] A1.2: To quantify the change in node affiliation between adjacent page units, a node continuity determination quantity is defined. For the first Page unit ( ), compare their node numbers Relative to the cell node number on the previous page : ;

[0056] in This indicates that the cell on this page belongs to the same NUMA node as the cell on the previous page (the nodes are consecutive). This indicates that a node switch has occurred.

[0057] A1.3: Define node switching indicator And count the total number of node switches in the entire virtual big page memory space: ;

[0058] in This indicates the total number of node switches. If... This indicates that all page units belong to the same NUMA node, and the premise that the absolute values ​​of the original virtual address relative offset and the physical memory relative offset are equivalent holds true; if This indicates that the contiguous virtual big page memory space actually corresponds to multiple dispersed NUMA physical domains, and the original linear equivalence assumption has failed.

[0059] A1.4: When At this time, the contiguous virtual massive page memory space is marked as the addressing domain to be reconstructed, and an initial addressing domain description parameter set is constructed. This parameter set contains at least the following information: starting virtual base address. Total number of page frames Page length The node numbering sequence of each page unit and a list of node switching positions (i.e., all nodes that meet the requirements) index ).

[0060] Step A2: Based on the initial addressing domain description parameter set output in Step A1, perform a sequential scan along the forward address space of the starting virtual base address, and merge page units with continuous and consistent node identifiers and continuous page frame addresses that meet the preset tolerance threshold requirements into candidate physical co-domain intervals. Calculate the effective length of each candidate physical co-domain interval, filter and retain intervals that simultaneously meet the constant node identifier condition and the continuous page frame determination condition, and output the candidate physical co-domain interval set.

[0061] In another embodiment, step A2 is as follows:

[0062] A2.1: Extract the total number of page frames from the initial addressing domain description parameter set output in step A1. Page length The node affiliation sequence for each page unit and the sequence of physical page frame starting addresses for each page unit. Along the starting virtual base address The forward address space is scanned sequentially starting from the first page unit, preparing to merge consecutive page units that meet the conditions into candidate intervals.

[0063] A2.2: For the first encountered during the scanning process Page unit ( First, determine its continuity with the nodes of the previous page: if If nodes are consecutive, then they are connected; otherwise, nodes are switched. Node continuity is one of the prerequisites for merging nodes into the same candidate interval.

[0064] A2.3: To prevent misclassification of linearly addressable intervals based solely on identical nodes, the physical continuity of page frames also needs to be quantified. Define the... Physical page frame spacing error between a page unit and the previous page unit:

[0065] ;

[0066] in This indicates the error in the physical page frame spacing between adjacent page units. For the first The physical page frame start address of each page unit. The page length (the value is determined by the big page mode, such as 4096 bytes, 2MB or 1GB).

[0067] This error reflects the deviation between the actual physical gaps between page frames and the ideal continuous page frames.

[0068] A2.4: Define the physical continuity determination function This is used to determine whether adjacent page units meet the physical continuity requirement. ;

[0069] in This is the physical continuity tolerance threshold, ranging from 0 to 64 bytes. When strict contiguous addressing is used... The preferred value is 0. Indicates the first If a page cell is physically contiguous with the previous page cell (or the deviation is within the allowable range), the merging condition is met.

[0070] A2.5: Execute sequential scan merging logic: Starting from the first page cell, adjacent page cells that satisfy both node continuity and physical continuity criteria are grouped into the same candidate interval; once a node switch or physical continuity failure is encountered ( If the interval ends, a new interval begins.

[0071] After the scan is completed, a series of candidate physical domain intervals are obtained, each interval consisting of several consecutive page units.

[0072] A2.6: For any candidate interval Assuming it contains If there are 1 page unit, then the effective length of the interval is: ;

[0073] in Indicates the first The effective length (in bytes) of each candidate physical co-domain interval.

[0074] This length is used to determine whether the static offset of the target field can be completely contained within this interval.

[0075] A2.7: For each candidate interval, extract and record the following four types of parameters: the starting virtual address of the interval (the virtual address corresponding to the first page unit within the interval), the starting physical address of the interval (the physical page frame start address of the first page unit within the interval). The NUMA node to which the interval belongs (the node number common to page cells within the interval) and the effective length of the interval. .

[0076] All intervals that satisfy the conditions of constant node number and consecutive page frames are summarized to form a candidate physical domain interval set. Each interval includes the four types of parameters mentioned above. It should be noted that this set refines the general continuous physical large pages in the original scheme into verifiable physical co-domain intervals, providing a boundary basis for the offset validity reconstruction in step A3.

[0077] Step A3: Based on the addressing mode of each candidate interval, reconstruct the global virtual starting address offset into the interval offset, including: first, determine whether the static offset of the target field falls within the current candidate interval; if it falls within the interval, calculate the local offset of the field within the interval and the corresponding effective physical address.

[0078] Synchronously check whether the field can be fully contained in the interval. If it can be contained, write the mapping relationship into the effective offset reconstruction table and output the deterministic mapping relationship table.

[0079] In another embodiment, step A3 is as follows:

[0080] A3.1: The set of candidate physical homogeneous regions output from step A2 Extract each interval from the middle. Starting offset reference Effective length Starting physical address and the node number to which it belongs.

[0081] in This represents the starting offset reference of the interval in the overall space of the target data structure (i.e., the offset of the first byte in the interval relative to the starting point of the target data structure). This value is determined by the difference between the starting virtual base address in step A1 and the starting virtual address of the interval.

[0082] A3.2: For the first For each business field, obtain its static offset relative to the overall starting point of the target data structure. .

[0083] The static offset comes from the static offset routing table pre-built in step S102 and is a fixed value determined at compile time.

[0084] A3.3: For each candidate interval and each business field Calculate the range of this field. Local offset within: ;

[0085] in Indicates the first The business field is relative to the first The local offset (in bytes) of the starting point of each candidate interval. The physical meaning of this value is: if the interval is regarded as an independent contiguous memory block, then the offset position of the field within that memory block.

[0086] A3.4: Definition of the interval accommodateability criterion function Used to determine the first Can the first business field be used by the second...? Each candidate interval is fully accommodated (i.e., the entire data range of the field does not exceed the interval boundary):

[0087] ;

[0088] in The effective length of the interval calculated in step A2.6. This indicates that the starting offset of the field falls within the interval;

[0089] A3.5: For those that satisfy For each field-range pair, calculate the effective physical address of that field within the range: ;

[0090] in Indicates the first The business field in the first Valid physical addresses in the candidate range This is the starting physical address of the range.

[0091] It should be noted that this formula directly superimposes the local offset in the virtual space onto the physical base address to obtain the actual physical memory address of the field.

[0092] A3.6: if and only if At that time, the mapping relationship is written to the effective offset reconstruction table. Each record contains the following five elements: field identifier (such as field name or hash fingerprint), range number, etc. Local offset Valid physical address and the node number (i.e., the interval) (NUMA node number)

[0093] The final effective offset reconstruction table is formed. It should be noted that this table replaces the original single-base addressing method, which relied on a single starting virtual address to correspond to all fields, with a reconstruction method of interval-based, multi-base address, and local offset. This means that the physical address of each field no longer depends on the global linear equivalence assumption, but is determined based on the actual physical domain interval, fundamentally making up for the lack of linear equivalence assumptions in cross-NUMA scenarios.

[0094] Step A4: Perform write domain locking for each field mapping. Use the field write permission function to comprehensively determine whether the field has a mapping, whether the target value length has not exceeded the interval boundary, and whether the interval node has been locked as a unique target node. When all three conditions are met, generate the final executable write address and output the executable write domain locking result.

[0095] In another embodiment, step A4 is as follows:

[0096] A4.1: Effective offset reconstruction table from step A3 Extract each mapping record (field identifier) Interval numbering Local offset Valid physical address (The node number to which it belongs), and obtain the actual byte length of the target value for each business field. (Determined by field type or message length). Define field mapping existence identifier. If the field exist If a mapping exists, the value is 1; otherwise, it is 0.

[0097] A4.2: For fields with mappings, determine their corresponding unique candidate intervals. And perform boundary determination: check Whether it is valid, among which This represents the valid length of the interval. If true, the boundary is indicated by the marker. Otherwise, it is 0. Simultaneously, a locking operation is performed on the NUMA node belonging to the interval (to prevent memory page migration). If the lock is successful, the node lock flag is updated. Otherwise, it is 0.

[0098] A4.3: Combining the above three identifiers, define the field to write the permission function:

[0099] ;

[0100] If and only if When the condition is met, it indicates that the field satisfies the triple constraints of verified node, verified range, and verified valid physical address, allowing in-situ writing; otherwise, writing is prohibited.

[0101] A4.4: For The field will contain the valid physical address. As the final executable write address: .for The field is marked as a non-linear writable field, and writing to it in the in-situ linear addressing mode is prohibited (it can fall back to the traditional reflection mapping or trigger addressing domain reconstruction).

[0102] The final output is the executable write domain lock result, which converges the calculable address in step A3 to the actual executable physical write address.

[0103] Step A5: Based on the executable write domain locking result output in Step A4, write the restricted in-situ address of each business field, and immediately perform address verification after writing to verify whether the written address is consistent with the expected address, whether the field is still within the original candidate range, and whether the node number is consistent with the locked node, and calculate the overall in-situ addressing controllability rate.

[0104] When the controllability rate reaches the preset threshold, the in-situ addressing is confirmed to be controllable; otherwise, return to step A1 to re-execute the addressing domain filtering and output the controllable in-situ addressing results under cross-NUMA scenarios.

[0105] In another embodiment, step A5 is as follows:

[0106] A5.1: Based on the final executable write address output in step A4 For each business field Implement restricted in-situ writes.

[0107] A5.2: Immediately after writing, perform address verification. The verification operation includes: reading the actual memory address of the written field, querying the interval number and NUMA node number to which the address belongs, and comparing it with the expected information before writing.

[0108] Define the address return kernel consistency function:

[0109] ;

[0110] in: The actual address after writing and If they match, return 1; otherwise, return 0. To determine whether the written field is still within the original candidate range, set the value to 1 if yes and 0 otherwise. This checks whether the NUMA node number of the page cell corresponding to the written address matches the locked node number; if yes, it is set to 1, otherwise it is set to 0.

[0111] A5.3: Count all business fields involved in the write operation and calculate the required parameters. Number of fields and the total number of fields involved in the write. Define the overall in-situ addressing controllability: ;

[0112] The value ranges from 0 to 1, and in engineering applications, a value of no less than 0.999 is preferred.

[0113] A5.4: Set the preset threshold for controllability The preferred value range is 0.990 to 1.000. If If the in-situ addressing is confirmed to be controllable in a cross-NUMA architecture scenario, the result of controllable in-situ addressing in a cross-NUMA scenario will be output; if If the current addressing domain is not used, the process returns to step A1 to re-execute the addressing domain filtering (i.e., re-perform node ownership detection, page frame continuity verification, offset reconstruction, and write locking).

[0114] A5.5: Through the above mechanism, the linear addressing that may get out of control in a cross-NUMA environment is transformed into a controllable in-situ addressing after node confirmation, range confirmation, offset reconstruction, write locking and result return to the kernel. This ensures that in a multi-node memory system, the target virtual address can be deterministically located and safely written, and finally outputs a controllable in-situ addressing result.

[0115] It should be noted that the above steps A1 to A5 are a specific implementation of the operation in step S103, in which the scheduling memory management unit locks the base addressing vector and writes the target value to the target physical memory offset address, under the cross-NUMA architecture. Specifically, steps A1 to A2 are used to confirm the node ownership and continuity of the physical memory domain, step A3 is used to reconstruct the effective offset mapping, step A4 is used for writing domain locking and address convergence, and step A5 is used for writing back to the kernel and controllability determination.

[0116] By pre-building a static offset routing table and linking it with runtime offset addressing operations, bypassing the dynamic type resolution and reflection detection process for the original byte stream, this mechanism eliminates the dynamic allocation overhead of intermediate dictionary parsing objects, reduces processor clock cycle loss to the level of basic addition arithmetic operations, suppresses memory oscillations caused by redundant object generation, eliminates garbage collection pauses, and ensures throughput performance under high-concurrency heterogeneous data requests. In specific implementation, the system registers a custom runtime class file converter during the startup phase of the managed virtual machine. Through bytecode injection technology, a short-circuit return instruction is injected into the core entry method of the standard deserialization component, forcing the current executing thread to skip the original reflection detection and instantiation logic of intermediate collection objects, and instead call the underlying system interface to perform the aforementioned in-situ memory overwrite operation.

[0117] Example 2: In a high-concurrency stress test scenario for a distributed microservice gateway, the system faces the risk of heap memory exhaustion and business flow interruption caused by parsing massive heterogeneous packets. A benchmark performance testing platform is built, including a multi-threaded stress test client, used to generate raw byte streams to be processed following a unified input model. The initial concurrent request volume is set to a range of 10,000 to 50,000 to simulate packet truncation and non-standard call interference in an industrial network environment. 15.5% of non-fixed-length mutated string key-value pairs are actively injected into the test data source as a random disturbance factor. This disturbance factor is used to examine the system's addressing mechanism. To ensure the stability of message flow under fragmented conditions, the sampling period for monitoring fragmentation indicators by the memory management unit is set. The value of this sampling period parameter is determined by the trade-off between the real-time nature of memory status perception and the additional clock cycle overhead of the processor caused by high-frequency monitoring. The system establishes a reciprocal correlation model based on the current number of concurrent connections and the available memory balance. When the number of concurrent connections exceeds the preset load benchmark and the available memory balance is less than 30.5% of the overall capacity, the system shrinks the sampling period to 5.0ms based on this model. This quantization setting enables the system to lock the memory distribution characteristics before triggering extreme memory overflow, providing data support for subsequent memory alignment actions.

[0118] A control group employing a dynamic reflection detection mechanism and an experimental group employing a static offset routing table in-situ addressing mechanism were constructed. Test data showed that in the control group, when the concurrent request volume climbed to 25,000, runtime dynamic type resolution frequently triggered the instantiation of intermediate dictionary parsing objects, garbage collection pause time surged to 145.8ms, and system throughput experienced a precipitous drop. The experimental group received data streams containing the same mutated perturbation messages, extracted the attribute identifier of the target key from the raw byte stream to be processed, and performed a match on the pre-loaded static offset routing table. This routing table, during its construction phase, did not simply record field lengths but instead established a physical topology index completely isomorphic to the memory layout of the business entity by parsing the metadata of the entity description file, thus enabling the implementation of... For irrelevant searches, the routing table maps attribute identifiers to fixed-length address maps and forcibly locks them in the system's kernel read-only buffer to ensure that the search operation can be hit within the CPU cache line. Unlike the offset pointers in D1, which are designed to solve cross-process object addressing, the routing table in this scheme is a physical drive matrix specifically designed for zero-reflection processing pipelines. It not only records the displacement, but also locks the absolute alignment boundaries of each business field in the physical carrier through pre-compilation, so that the input byte stream can be directly transformed into the memory state of the business entity like a mirror projection without establishing an intermediate communication object. The corresponding static offset value is 128 bytes. The system extracts the starting physical base address of the contiguous memory block of the target data structure and uses the formula Calculate the addressing path, where, The target physical memory offset address, The starting physical base address of the contiguous memory block containing the target data structure. As the static offset corresponding to the target key, the memory controller directly injects and overwrites the binary target value data in the original byte stream to be processed in situ based on the calculated target physical memory offset address. The contiguous memory region where the target physical memory offset address is overwritten is off-heap direct memory independent of the jurisdiction of the regular garbage collector. The system projects the business field directly to this off-heap region according to the static offset by pre-allocating a fixed-length byte array. This process does not generate any managed objects with standard object headers. Therefore, the write region is completely invisible to the reachability analysis map of the regular garbage collector, preventing pointer-level absolute address direct writing from destroying the safety boundary of the high-level language managed memory. This achieves system-level self-consistency between the underlying physical in-situ write and the upper-level anti-jitter mechanism.

[0119] For variable-length mutated strings mixed into a byte stream, the contiguous memory space of the target data structure is divided into a pre-fixed-length index area and a post-variable-length data area. The system uses static offsets. The system calculates the fixed-length index pointer address corresponding to the key value, writes the actual byte span and relative offset scalar of the string at the address, and appends the specific message sequence of the string to the subsequent variable-length data area, maintaining the absolute constancy of the addressing path of each business field in the preceding fixed-length index area. Gradient operation data from the test group is collected to verify the evolution of the mechanism. When the concurrent request volume gradually increases from 10,000 to 40,000, the garbage collection pause time in the test group remains within the range of 4.2ms to 5.1ms. The system throughput shows a linear growth characteristic that is positively matched with the request volume. When the concurrent request volume exceeds... After the critical point of 45,000, the throughput growth curve reaches a non-linear inflection point and enters a stable saturation region. The physical essence of this plateau phenomenon is that the static offset routing mechanism reduces the protocol parsing loss of the application layer to the minimum threshold. The overall performance limit of the system is shifted to the hardware limit of the physical transmit and receive bandwidth of the network card. The gradient comparison test data above reflects that the static offset in-situ addressing architecture relies on the fixed spatial displacement mapping relationship to suppress disordered disturbances and reduce garbage collection time. After the system crosses the concurrency threshold of the conventional reflection mechanism, it maintains a constant level of data flow efficiency, meeting the throughput requirements of high-concurrency digital signal processing.

[0120] Example 3: In a high-load gateway node processing variable-length heterogeneous service fields, the system receives a raw byte stream containing single-byte boolean values ​​and four-byte integer values. Based on the static offset routing table, this raw byte stream is written into physical memory. Different data types have physically different field lengths. A continuous and compact memory allocation layout causes the physical starting address of some service fields to deviate from the processor's word length alignment boundary. Unaligned memory accesses across cache line boundaries trigger multiple bus read cycles, increasing the microarchitecture layer clock cycle time and limiting system data throughput. The unified input model standardizes the message using preset byte alignment rules. For example, in a 64-bit processor architecture, the word length baseline parameter is set to 8 bytes. If a certain... If a one-key-value pair attribute occupies only 1 byte of physical space, the rule mandates 7 bytes of blank space after this field to ensure that the physical starting boundary of subsequent attributes is always at an offset that is an integer multiple of 8 bytes. Based on this, the generic parameter list carries heterogeneous attributes through reserved fixed-width slots, while the sorting vector encoded in the message header records the linear arrangement position of each business field in the physical sequence of the current request. This is used to quickly verify whether the message topology conforms to the preset model in the zero-reflection processing pipeline. During the compilation phase, the system verifies the memory alignment rules based on hardware word length characteristics. When constructing the static offset routing table, the memory management unit extracts the word length baseline parameter of the target processor, obtains the initial static offset of the target key for the parsed target key, and applies the formula... Calculate the alignment padding interval, where, Add the number of blank bytes needed for alignment. This is the base parameter for word length, which represents the physical byte width of a single memory access. This is the initial static offset. This represents the modulo operation using the word length reference parameter as the modulus, when the alignment padding interval... Less than the word length reference parameter When the system accumulates the alignment padding interval and the initial static offset, it generates a memory-aligned static offset and then fixes the memory-aligned static offset into the static offset routing table.

[0121] During system operation, the fragmentation index of heap memory is monitored. This fragmentation index represents the ratio of the cumulative total of alignment and padding intervals in the target data structure within a set time window to the total number of bytes allocated in contiguous memory blocks. During system initialization, concurrent data requests are injected into the gateway, and the absolute time taken to trigger garbage collection and the number of packet losses in the network input buffer queue are recorded under different fragmentation indices. Calibration data shows that when the absolute garbage collection time reaches 30ms, the network buffer queue packet loss rate shows an upward inflection point. Based on this calibration data, the system sets 30ms as the preset time threshold for triggering garbage collection pauses. This calibration process is conducted in a LAN environment equipped with a 10 Gigabit Ethernet physical network card. The test end is set at a time of 10ms. Test packets are pushed onto the gateway node at a fixed rate of 100,000 concurrent connections per second. By capturing real-time overflow data from the operating system kernel protocol stack receive buffer, it is determined that when the application layer processing thread's garbage collection pause time accumulates to 30ms, the kernel-side receive buffer, unable to be read and consumed by user-mode processes in time, triggers a full-load drop mechanism, causing an exponential jump in the packet loss rate curve. This establishes the network queuing theory basis for this preset time threshold. When the real-time monitored garbage collection pause time exceeds this 30ms threshold and the fragmentation index is greater than 15%, the memory management unit compacts the memory space, reclaiming discrete, aligned, and filled blank byte blocks. The process of performing memory alignment rule verification includes: real-time extraction of the target processor's hardware word length reference parameter; determining whether the physical start boundary of the currently processed business field meets the word length alignment constraint; if the verification result shows that the physical start boundary is not at an offset position that is an integer multiple of the word length reference parameter, it is determined that an unaligned access risk has been triggered. Subsequently, the system injects a preset length of alignment padding bits into the preorder space of the physical start address of the business field, or uses arithmetic instructions to shift the physical start boundary of the data segment, until the target physical memory offset address is corrected to an alignment address that conforms to the width of the processor's data bus. Through this dynamic calibration of the memory address, the system ensures single-pass alignment. The complete reading and writing of business parameters can be completed with a single instruction access, eliminating instruction pipeline blockage caused by accessing across cache line boundaries. This suppresses memory oscillations and system stalls caused by reduced data access efficiency at the underlying execution level. The static offset reconstruction logic based on hardware word length characteristics and the dynamic fragmentation threshold monitoring logic work together to ensure that the write address of the target key-value data conforms to the physical data bus boundary of the processor. While maintaining the in-situ overwrite state of the data flow, the system prevents data access operations across cache lines, reduces processor clock cycle loss caused by unaligned access, and maintains the data transmission throughput of the electronic digital data processing system when processing heterogeneous business parameters.

[0122] Example 4: When the system faces cold start or business data structure model iteration, the memory management unit triggers offline structure parsing and data filling procedures before receiving front-end network requests. The system reads the metadata description file of the target data structure. When determining the addressing path of each field, the memory management unit first marks the starting anchor point of the contiguous memory space. The marking of this anchor point is based on the positioning of the first atomic attribute in the entity description file during the compilation stage. The system uses the starting byte of this first attribute as a reference, and according to the physical order of the field declaration, it accumulates the byte length occupied by all preceding fields and the padding bytes generated by the byte alignment rules, thereby dynamically calculating the absolute displacement scalar of the current business field relative to the starting position. The system extracts the physical byte length corresponding to the data type of each business field, uses the sum of the physical byte lengths of the preceding fields to determine the initial physical offset of the current business field, and traverses each business field unidirectionally according to the memory contiguous allocation constraint. An abstract syntax tree parser is used to read JSON or XML format. The interface protocol description file extracts feature vectors containing field names, data types, and nesting levels as atomic metadata nodes. Atomization refers to completely flattening the nested protocol structure into indivisible metadata units. Each metadata node is a minimum information packet describing a specific field attribute. The system recursively traverses the protocol tree and extracts each leaf node into a numerical array containing field logical semantics, protocol level depth, field length threshold, and encoding type index. This procedure transforms the ambiguous text protocol description into structured features that can be directly computed by the computer, thereby eliminating the semantic bias and repeated parsing overhead generated by traditional frameworks when parsing interface description files. Subsequently, a two-dimensional logical mapping matrix is ​​constructed using the interface input parameter feature vector as row vectors and the business entity attribute feature vector as column vectors. The construction logic of this logical mapping matrix is ​​based on the linear correlation of two core feature vectors: the interface input parameter feature vector, whose dimensions cover the parameter hash fingerprint, protocol constraint code, and input sequence weight defined in the interface layer;Business entity attribute feature vector: Its dimensions encompass the memory offset address index, business logic constraints, and physical storage precision corresponding to the business entity. The system identifies the intersection of these two vectors in the logical mapping space, assigning them specific transformation weights or operator indices to generate a logical mapping matrix. This matrix transforms the traditional semantic mapping of field A to field B into a linear transformation relationship between two multi-dimensional feature spaces, enabling the mapping logic to be executed in the high-speed pipeline in the form of matrix operations. The elements of this matrix are Boolean or basic transformation coefficients, used to indicate and quantify whether there is a one-to-one memory address mapping or a fixed-ratio type conversion between interface fields and business fields. The system extracts the physical byte length corresponding to the data type of each business field, and uses the sum of the physical byte lengths of the preceding fields to determine the initial physical offset of the current business field. The system calls an unencrypted hash algorithm to extract a fixed-length numerical digest as a hash fingerprint based on the attribute identifier of the current business field. The unencrypted hash algorithm is a specialized... This fast hashing mechanism, optimized for large-scale data retrieval scenarios rather than for secure information transmission, is characterized by extremely high execution efficiency and low collision rate. The specific process for extracting hash fingerprints includes: using the attribute identifier of the current business field as the input operator, employing pre-defined multi-round bitwise operation logic to obfuscate and avalanche effect processes the string byte stream, ultimately mapping it to a fixed-length numerical digest. Introducing this type of non-encrypted hashing algorithm aims to bypass the high instruction cycle overhead of traditional encryption algorithms. Leveraging its parallel execution characteristics at the CPU instruction set level, it quickly transforms complex business keys into deterministic physical indexes in a static offset routing table. This establishes a logical path for constant-level addressing based on hash fingerprints. Furthermore, the hash fingerprint and the initial physical offset are fused to construct constant mapping entries, which are then sequentially written into pre-allocated contiguous physical memory space. This process generates an initial static offset routing table covering the addressing characteristics of all business fields in the target data structure.

[0123] After constructing the initial static offset routing table, the system allocates an independent sandbox test memory block in the main memory space and injects a benchmark verification byte stream containing all types of business fields into it. The test module writes the benchmark verification byte stream in place according to the constant mapping entries recorded in the initial static offset routing table, and captures a complete binary snapshot of the sandbox test memory block at the time of writing termination. The test module performs a byte-by-byte XOR comparison between the complete binary snapshot and the physical mirror output by the benchmark serialization component. When the byte-by-byte XOR comparison output result is zero, the system confirms that the memory space offset index of each business field fits the processor's word length alignment boundary. The memory controller reclaims the write permission of the memory segment where the initial static offset routing table is located, changes the memory segment to global read-only mode, and loads it into the system kernel buffer, completing the calibration of the underlying data flow path before the deployment of the high-concurrency addressing module.

[0124] When the system is running and responding to incremental updates of the interface protocol description file, the memory management unit constructs a secondary static offset routing table in an independent sandbox, writes the affected mapping paths and transformation instruction sets, triggers atomic pointer swapping operations, directly redirects the system kernel working area access pointers to the secondary static offset routing table, and delays the release of residual memory blocks under the old mapping paths according to the reference counting mechanism, eliminating bus locking pauses during business reload. The transformation instruction set consists of a series of atomic data transformation operators. Each operator is fixed in memory structure as an inline function pointer or independent expression containing only a single basic mathematical operation function. The system continuously pushes all function pointers corresponding to the affected mapping paths into the preset data transformation pipeline according to the logical matrix calculation order, and uses the processor's pipeline execution engine to call them sequentially, thereby completing the decoupling and safe reload of business logic at the pure mathematical calculation level.

[0125] The embodiments of this application have been described above with reference to the accompanying drawings. Unless otherwise specified, the embodiments and features in the embodiments of this application can be combined with each other. This application is not limited to the specific embodiments described above. The specific embodiments described above are merely illustrative and not restrictive. Those skilled in the art can make many other forms under the guidance of this application without departing from the spirit of this application and the scope of protection of this invention, and all of these forms are within the protection scope of this application.

Claims

1. A backend interface framework development method, characterized in that, Includes the following steps: Step S101: Obtain the raw byte stream to be processed. The raw byte stream to be processed follows a unified input model. The unified input model limits the key-value pair attributes, request page identifier, and sorting vector in the generic parameter list through a preset byte alignment rule. The raw byte stream to be processed is presented as a continuous binary message sequence in the physical carrier. Step S102: Extract the attribute identifier of the target key from the original byte stream to be processed, and use the attribute identifier as a key index to perform a conflict-free lookup and matching in the static offset routing table loaded in the system kernel buffer to obtain the static offset of the target key in the contiguous memory block of the target data structure relative to the starting physical base address. The static offset routing table is pre-built during the system compilation stage by parsing the metadata description file of the target data structure to establish a deterministic mapping relationship between the attribute identifier and the physical memory space displacement, so as to ensure that each business field corresponds to a unique memory space offset indicator. Step S103: The starting physical base address and the static offset are accumulated by addition arithmetic operations to determine the target physical memory offset address corresponding to the target key. The memory management unit is then scheduled to lock the base addressing vector of the target data structure in the heap memory. The target value data in the raw byte stream to be processed is directly written into the physical storage unit corresponding to the target data structure according to the target physical memory offset address. This bypasses the string hash dynamic comparison logic, the type detection logic in the reflection mechanism, and the dynamic memory allocation procedure of the intermediate dictionary parsing object in the conventional development framework for the raw byte stream to be processed by the shift addressing operation at the physical addressing level.

2. The method of claim 1, wherein, The construction process of the static offset routing table in step S102 includes: step S1021, parsing the entity description file of the backend business system, extracting the atomic attribute identifiers of each business field and the byte length occupied by each attribute in physical memory, and establishing an association mapping record between the attribute identifier and the byte length; step S1022, according to the declaration order of the business fields in the entity description file and the byte length, calculating the cumulative displacement of each business field relative to the starting position in the contiguous memory block of the target data structure, determining the memory offset interval of each field according to the cumulative displacement, encapsulating the atomic attribute identifier and the corresponding memory offset interval into a static routing entry with a key-value mapping relationship and persistently storing it in a read-only memory buffer.

3. The method of claim 1, wherein, The method further includes: step S104, quantizing the interface protocol description file into atomic metadata nodes, and generating a logical mapping matrix based on the metadata nodes, wherein the logical mapping matrix records the linear transformation logic between interface fields and business fields; step S105, obtaining the atomic data transformation operator coupled with the logical mapping matrix, and injecting the atomic data transformation operator into the data transformation pipeline, so as to complete the logical decoupling between the interface protocol layer and the business logic layer by using the mathematical transformation path, and ensuring that changes in the interface protocol only trigger the parameter adjustment of the logical mapping matrix.

4. The method of claim 3, wherein, When a change in the interface protocol description file is detected during system operation, the method further includes: step S106, performing an incremental update of the logical mapping matrix. This incremental update determines the affected mapping path by comparing the differences between the metadata nodes before and after the change, and reloads the transformation instruction set corresponding to the changed path in memory, so as to realize the business reload of the system without recompiling and without downtime, and ensure the continuity of the electronic digital data processing system's response to external requests.

5. The method of claim 1, wherein, The process of writing the target value in step S103 includes: step S1031, intercepting the intermediate object instantiation request in the deserialization pipeline to block the allocation of intermediate redundant objects in the heap memory; step S1032, locating the contiguous memory space allocated in the heap memory for the target data structure, and directly injecting the binary data in the original byte stream into the contiguous memory space according to the target physical memory offset address, so that the business parameters in the original byte stream are directly converted into the memory image state of the business entity, avoiding the data copying loss in the traditional parsing process.

6. The method of claim 1, wherein, After completing the in-situ memory overwrite, the method further includes: step S107, monitoring the fragmentation index of the heap memory and the garbage collection pause time, the fragmentation index reflecting the success rate of contiguous memory space allocation; step S108, when the garbage collection pause time exceeds a preset time threshold of 30ms, starting the memory management unit to perform memory alignment rule verification, by adjusting the physical starting boundary of the data segment to make the write address of each business field conform to the processor's word length constraint, so as to suppress the memory space pressure caused by the generation of large-scale intermediate objects.

7. The method of claim 1, wherein the back-end interface framework is developed by: The table lookup matching process in step S102 includes: step S1023, calculating the hash fingerprint corresponding to the identifier of the target key, which is used to convert the variable-length string identifier into a fixed-length numerical digest; step S1024, retrieving a constant entry that matches the hash fingerprint from the static offset routing table, and using the address index of the constant entry to determine the address mapping result of the offset, so as to ensure that the time complexity of address retrieval remains at a constant level when processing high-concurrency requests, thereby reducing processor clock cycle loss.

8. The method of claim 1, wherein, The generic parameter list in the unified input model carries heterogeneous business parameters through a list structure. This list structure occupies a header field of a preset length in the physical message, and the static offset routing table assigns a unique addressing path to each set of preset parameter pairs in the generic parameter list. This addressing path is fixed in the hash bucket structure of the routing table through static hard coding to eliminate the type inference overhead caused by dynamic parsing of generic parameters at runtime. After step S101, the model further includes: step S1011, identifying the request priority identifier in the raw byte stream to be processed. The request priority identifier is encoded in the feature bits of the message header of the byte stream; step S1012, when the request priority identifier represents a high-concurrency digital signal request, scheduling the raw byte stream to be processed into the zero-reflection processing pipeline, and shortening the residence time of a single request in the processor core by forcibly executing in-situ memory overwrite logic.

9. A back-end interface framework development system for implementing the back-end interface framework development method of claim 1, characterized by include: The data acquisition module is used to acquire the raw byte stream to be processed that follows a unified input model, and when it detects that the request priority identifier in the raw byte stream to be processed represents a high-concurrency digital signal request, it locks it into the zero-reflection processing pipeline. The address interpretation module is connected to the static offset routing table pre-stored in the system kernel buffer. It is used to extract the attribute identifier of the target key in the raw byte stream to be processed and perform a conflict-free table lookup match to obtain the static offset of the target key relative to the starting physical base address in the contiguous memory block of the target data structure. The in-situ storage module is used to accumulate the starting physical base address and the static offset to determine the target physical memory offset address, and to schedule the memory management unit to lock the addressing vector of the target data structure in the heap memory, and inject the target value in the raw byte stream to be processed into the physical storage unit corresponding to the target data structure according to the target physical memory offset address.

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