前面已经分析了内存管理框架的构建实现过程，有部分内容未完全呈现出来，这里主要做个补充。
如下图，这是前面已经看到过的linux物理内存管理框架的层次关系。
现着重分析一下各个管理结构体的成员功能作用。
【file：/include/linux/mmzone.h】
typedef struct pglist_data {
struct zone node_zones[MAX_NR_ZONES];
struct zonelist node_zonelists[MAX_ZONELISTS];
int nr_zones;
#ifdef CONFIG_FLAT_NODE_MEM_MAP /* means !SPARSEMEM */
struct page *node_mem_map;
#ifdef CONFIG_MEMCG
struct page_cgroup *node_page_cgroup;
#endif
#endif
#ifndef CONFIG_NO_BOOTMEM
struct bootmem_data *bdata;
#endif
#ifdef CONFIG_MEMORY_HOTPLUG
/*
* Must be held any time you expect node_start_pfn, node_present_pages
* or node_spanned_pages stay constant. Holding this will also
* guarantee that any pfn_valid() stays that way.
*
* pgdat_resize_lock() and pgdat_resize_unlock() are provided to
* manipulate node_size_lock without checking for CONFIG_MEMORY_HOTPLUG.
*
* Nests above zone->lock and zone->span_seqlock
*/
spinlock_t node_size_lock;
#endif
unsigned long node_start_pfn;
unsigned long node_present_pages; /* total number of physical pages */
unsigned long node_spanned_pages; /* total size of physical page
range, including holes */
int node_id;
nodemask_t reclaim_nodes; /* Nodes allowed to reclaim from */
wait_queue_head_t kswapd_wait;
wait_queue_head_t pfmemalloc_wait;
struct task_struct *kswapd; /* Protected by lock_memory_hotplug() */
int kswapd_max_order;
enum zone_type classzone_idx;
#ifdef CONFIG_NUMA_BALANCING
/* Lock serializing the migrate rate limiting window */
spinlock_t numabalancing_migrate_lock;
/* Rate limiting time interval */
unsigned long numabalancing_migrate_next_window;
/* Number of pages migrated during the rate limiting time interval */
unsigned long numabalancing_migrate_nr_pages;
#endif
} pg_data_t;
truct zone node_zones[MAX_NR_ZONES];
——存放该pg_data_t里面的zone；
struct zonelist node_zonelists[MAX_ZONELISTS];
——其用于管理备用节点及内存域的列表，该列表表示内存分配策略。该链表将node_zones串联起来，其串联zone的顺序就是各区的内存申请顺序，例如normal->dma->highmem，申请时也将会是先从normal区中申请，如果申请不到，再依序到从dma区、highmem区去申请；
int nr_zones;
——用于记录zone的个数；
struct page *node_mem_map;
——其指向一个page结构的数组，数组中的每个成员为该节点中的一个物理页面，于是整个数组就对应了该节点中所有的物理页面；
struct page_cgroup *node_page_cgroup;
——用于管理page_cgroup，原来的page_cgroup是page页面管理结构的一个成员，现在移到这里了，它将会在初始化时所有的page_cgroup都将申请下来；
struct bootmem_data *bdata;
——该数据指向bootmem_node_data，可以通过system.map查到。原是用于bootmem内存分配器的信息存储，当前改用memblock算法，则不存在该成员；
unsigned long node_start_pfn;
——指向当前pg_data_t结构管理的物理起始页面；
unsigned long node_present_pages;
——记录物理页面数总量，除开内存空洞的物理页面数；
unsigned long node_spanned_pages;
——最大和最小页面号的差值，包括内存空洞的总的物理页面大小；
int node_id;
——pg_data_t对应的索引号，非NUMA架构下该值为0；
nodemask_t reclaim_nodes;
——用于记录可回收的内存管理节点node信息；
wait_queue_head_t kswapd_wait;
——kswapd是页面交换守护线程，该线程会阻塞在这个等待队列，当满足条件后，调用wake_up_interruptible()唤醒该队列进行相关操作；
wait_queue_head_t pfmemalloc_wait;
——用于减缓内存直接回收；
struct task_struct *kswapd;
——指向kswapd守护线程的任务指针；
int kswapd_max_order;
——用于表示kswapd守护线程每次回收的页面个数；
enum zone_type classzone_idx;
——该成员与kswapd有关；
【file：/include/linux/mmzone.h】
struct zone {
/* Fields commonly accessed by the page allocator */
/* zone watermarks, access with *_wmark_pages(zone) macros */
unsigned long watermark[NR_WMARK];
/*
* When free pages are below this point, additional steps are taken
* when reading the number of free pages to avoid per-cpu counter
* drift allowing watermarks to be breached
*/
unsigned long percpu_drift_mark;
/*
* We don't know if the memory that we're going to allocate will be freeable
* or/and it will be released eventually, so to avoid totally wasting several
* GB of ram we must reserve some of the lower zone memory (otherwise we risk
* to run OOM on the lower zones despite there's tons of freeable ram
* on the higher zones). This array is recalculated at runtime if the
* sysctl_lowmem_reserve_ratio sysctl changes.
*/
unsigned long lowmem_reserve[MAX_NR_ZONES];
/*
* This is a per-zone reserve of pages that should not be
* considered dirtyable memory.
*/
unsigned long dirty_balance_reserve;
#ifdef CONFIG_NUMA
int node;
/*
* zone reclaim becomes active if more unmapped pages exist.
*/
unsigned long min_unmapped_pages;
unsigned long min_slab_pages;
#endif
struct per_cpu_pageset __percpu *pageset;
/*
* free areas of different sizes
*/
spinlock_t lock;
#if defined CONFIG_COMPACTION || defined CONFIG_CMA
/* Set to true when the PG_migrate_skip bits should be cleared */
bool compact_blockskip_flush;
/* pfns where compaction scanners should start */
unsigned long compact_cached_free_pfn;
unsigned long compact_cached_migrate_pfn;
#endif
#ifdef CONFIG_MEMORY_HOTPLUG
/* see spanned/present_pages for more description */
seqlock_t span_seqlock;
#endif
struct free_area free_area[MAX_ORDER];
#ifndef CONFIG_SPARSEMEM
/*
* Flags for a pageblock_nr_pages block. See pageblock-flags.h.
* In SPARSEMEM, this map is stored in struct mem_section
*/
unsigned long *pageblock_flags;
#endif /* CONFIG_SPARSEMEM */
#ifdef CONFIG_COMPACTION
/*
* On compaction failure, 1<<compact_defer_shift compactions
* are skipped before trying again. The number attempted since
* last failure is tracked with compact_considered.
*/
unsigned int compact_considered;
unsigned int compact_defer_shift;
int compact_order_failed;
#endif
ZONE_PADDING(_pad1_)
/* Fields commonly accessed by the page reclaim scanner */
spinlock_t lru_lock;
struct lruvec lruvec;
unsigned long pages_scanned; /* since last reclaim */
unsigned long flags; /* zone flags, see below */
/* Zone statistics */
atomic_long_t vm_stat[NR_VM_ZONE_STAT_ITEMS];
/*
* The target ratio of ACTIVE_ANON to INACTIVE_ANON pages on
* this zone's LRU. Maintained by the pageout code.
*/
unsigned int inactive_ratio;
ZONE_PADDING(_pad2_)
/* Rarely used or read-mostly fields */
/*
* wait_table -- the array holding the hash table
* wait_table_hash_nr_entries -- the size of the hash table array
* wait_table_bits -- wait_table_size == (1 << wait_table_bits)
*
* The purpose of all these is to keep track of the people
* waiting for a page to become available and make them
* runnable again when possible. The trouble is that this
* consumes a lot of space, especially when so few things
* wait on pages at a given time. So instead of using
* per-page waitqueues, we use a waitqueue hash table.
*
* The bucket discipline is to sleep on the same queue when
* colliding and wake all in that wait queue when removing.
* When something wakes, it must check to be sure its page is
* truly available, a la thundering herd. The cost of a
* collision is great, but given the expected load of the
* table, they should be so rare as to be outweighed by the
* benefits from the saved space.
*
* __wait_on_page_locked() and unlock_page() in mm/filemap.c, are the
* primary users of these fields, and in mm/page_alloc.c
* free_area_init_core() performs the initialization of them.
*/
wait_queue_head_t * wait_table;
unsigned long wait_table_hash_nr_entries;
unsigned long wait_table_bits;
/*
* Discontig memory support fields.
*/
struct pglist_data *zone_pgdat;
/* zone_start_pfn == zone_start_paddr >> PAGE_SHIFT */
unsigned long zone_start_pfn;
/*
* spanned_pages is the total pages spanned by the zone, including
* holes, which is calculated as:
* spanned_pages = zone_end_pfn - zone_start_pfn;
*
* present_pages is physical pages existing within the zone, which
* is calculated as:
* present_pages = spanned_pages - absent_pages(pages in holes);
*
* managed_pages is present pages managed by the buddy system, which
* is calculated as (reserved_pages includes pages allocated by the
* bootmem allocator):
* managed_pages = present_pages - reserved_pages;
*
* So present_pages may be used by memory hotplug or memory power
* management logic to figure out unmanaged pages by checking
* (present_pages - managed_pages). And managed_pages should be used
* by page allocator and vm scanner to calculate all kinds of watermarks
* and thresholds.
*
* Locking rules:
*
* zone_start_pfn and spanned_pages are protected by span_seqlock.
* It is a seqlock because it has to be read outside of zone->lock,
* and it is done in the main allocator path. But, it is written
* quite infrequently.
*
* The span_seq lock is declared along with zone->lock because it is
* frequently read in proximity to zone->lock. It's good to
* give them a chance of being in the same cacheline.
*
* Write access to present_pages at runtime should be protected by
* lock_memory_hotplug()/unlock_memory_hotplug(). Any reader who can't
* tolerant drift of present_pages should hold memory hotplug lock to
* get a stable value.
*
* Read access to managed_pages should be safe because it's unsigned
* long. Write access to zone->managed_pages and totalram_pages are
* protected by managed_page_count_lock at runtime. Idealy only
* adjust_managed_page_count() should be used instead of directly
* touching zone->managed_pages and totalram_pages.
*/
unsigned long spanned_pages;
unsigned long present_pages;
unsigned long managed_pages;
/*
* Number of MIGRATE_RESEVE page block. To maintain for just
* optimization. Protected by zone->lock.
*/
int nr_migrate_reserve_block;
/*
* rarely used fields:
*/
const char *name;
} ____cacheline_internodealigned_in_smp;
unsigned long watermark[NR_WMARK];
——该数组有三个值WMARK_MIN、WMARK_LOW、WMARK_HIGH，如命名所标识，min最小，low居中，high最大。内存分配过程中，当空闲页面达到low时，内存分配器会唤醒kswapd守护进程来回收物理页面；当空闲页面达到min时，内存分配器就会唤醒kswapd以同步方式回收；如果kswapd被唤醒后，空闲页面达到high时，则会使kswapd再次休眠；
unsigned long percpu_drift_mark;
——当空闲页面低于该值，将会引发附加操作的执行，用于避免前面的watermark被冲破；
unsigned long lowmem_reserve[MAX_NR_ZONES];
——记录每个管理区中必须保留的物理页面数，以用于紧急状况下的内存分配；
unsigned long dirty_balance_reserve;
——用于表示不会被内存分配器分配出去的空闲页面部分的近似值；
struct per_cpu_pageset __percpu *pageset;
——该数组里面的成员pcp用于实现冷热页面的管理；
spinlock_t lock;
——spinlock锁，用于解决该管理区的并发问题；
struct free_area free_area[MAX_ORDER];
——主要用于Buddy内存管理算法（伙伴算法），里面有数量为MIGRATE_TYPES个的free_list链表，分别用于管理不同迁移类型的内存页面；
unsigned long *pageblock_flags;
——与伙伴算法的碎片迁移算法有关；
spinlock_t lru_lock;
——用于保护lruvec结构数据；
struct lruvec lruvec;
——lruvec该数组里面有一个lists是用于lru管理的链表，另外有一个reclaim_stat用于页面回收的状态标示；
unsigned long pages_scanned;
——用于记录上次物理页面回收时，扫描过的页描述符总数；
unsigned long flags;
——用于表示当前内存管理区的状态；
atomic_long_t vm_stat[NR_VM_ZONE_STAT_ITEMS];
——用于统计该内存管理区中各项状态的数值；
unsigned int inactive_ratio;
——不活跃的页面比例；
wait_queue_head_t *wait_table;
unsigned long wait_table_hash_nr_entries;
unsigned long wait_table_bits;
——当多个进程同时访问同一页面时，必然会有进程先行访问操作，此时该页面不可用，因此其他的则需阻塞等待。当页面不可用时，则会将页面进行hash运算加入到该管理区wait_table的哈希表中，当页面可用时将会把里面任务列表中等待的进程进行唤醒。如果存在多个页面有相同的hash值，那么这些等待不同页面的任务仍然会睡眠在同一个hash表节点下，当相同hash值的某个页面可用时，将会唤醒所有进程，当进程在唤醒时需要检查是否是自己所等待的页面。其中wait_table_hash_nr_entries表示该哈希表中等待队列的数量，
struct pglist_data *zone_pgdat;
——指向该内存管理区的pg_data_list；
unsigned long zone_start_pfn;
——记录当前内存管理区中最小的物理页面号；
unsigned long spanned_pages;
——记录内存管理区的总页面数，包括内存空洞的页面数，实则上是管理区末尾页面号和起始页面号的差值；
unsigned long present_pages;
——除去内存空洞后的内存管理区实际有效的总页面数；
unsigned long managed_pages;
——用于记录被内存管理算法管理的物理页面数，这是除去了在初始化阶段被申请的页面；
int nr_migrate_reserve_block;
——用于优化的，记录内存迁移保留的页面数；
const char *name;
——用于记录该管理区的名字；
【file：/include/linux/mmzone.h】
/*
* Each physical page in the system has a struct page associated with
* it to keep track of whatever it is we are using the page for at the
* moment. Note that we have no way to track which tasks are using
* a page, though if it is a pagecache page, rmap structures can tell us
* who is mapping it.
*
* The objects in struct page are organized in double word blocks in
* order to allows us to use atomic double word operations on portions
* of struct page. That is currently only used by slub but the arrangement
* allows the use of atomic double word operations on the flags/mapping
* and lru list pointers also.
*/
struct page {
/* First double word block */
unsigned long flags; /* Atomic flags, some possibly
* updated asynchronously */
union {
struct address_space *mapping; /* If low bit clear, points to
* inode address_space, or NULL.
* If page mapped as anonymous
* memory, low bit is set, and
* it points to anon_vma object:
* see PAGE_MAPPING_ANON below.
*/
void *s_mem; /* slab first object */
};
/* Second double word */
struct {
union {
pgoff_t index; /* Our offset within mapping. */
void *freelist; /* sl[aou]b first free object */
bool pfmemalloc; /* If set by the page allocator,
* ALLOC_NO_WATERMARKS was set
* and the low watermark was not
* met implying that the system
* is under some pressure. The
* caller should try ensure
* this page is only used to
* free other pages.
*/
};
union {
#if defined(CONFIG_HAVE_CMPXCHG_DOUBLE) && \
defined(CONFIG_HAVE_ALIGNED_STRUCT_PAGE)
/* Used for cmpxchg_double in slub */
unsigned long counters;
#else
/*
* Keep _count separate from slub cmpxchg_double data.
* As the rest of the double word is protected by
* slab_lock but _count is not.
*/
unsigned counters;
#endif
struct {
union {
/*
* Count of ptes mapped in
* mms, to show when page is
* mapped & limit reverse map
* searches.
*
* Used also for tail pages
* refcounting instead of
* _count. Tail pages cannot
* be mapped and keeping the
* tail page _count zero at
* all times guarantees
* get_page_unless_zero() will
* never succeed on tail
* pages.
*/
atomic_t _mapcount;
struct { /* SLUB */
unsigned inuse:16;
unsigned objects:15;
unsigned frozen:1;
};
int units; /* SLOB */
};
atomic_t _count; /* Usage count, see below. */
};
unsigned int active; /* SLAB */
};
};
/* Third double word block */
union {
struct list_head lru; /* Pageout list, eg. active_list
* protected by zone->lru_lock !
*/
struct { /* slub per cpu partial pages */
struct page *next; /* Next partial slab */
#ifdef CONFIG_64BIT
int pages; /* Nr of partial slabs left */
int pobjects; /* Approximate # of objects */
#else
short int pages;
short int pobjects;
#endif
};
struct list_head list; /* slobs list of pages */
struct slab *slab_page; /* slab fields */
struct rcu_head rcu_head; /* Used by SLAB
* when destroying via RCU
*/
#if defined(CONFIG_TRANSPARENT_HUGEPAGE) && USE_SPLIT_PMD_PTLOCKS
pgtable_t pmd_huge_pte; /* protected by page->ptl */
#endif
};
/* Remainder is not double word aligned */
union {
unsigned long private; /* Mapping-private opaque data:
* usually used for buffer_heads
* if PagePrivate set; used for
* swp_entry_t if PageSwapCache;
* indicates order in the buddy
* system if PG_buddy is set.
*/
#if USE_SPLIT_PTE_PTLOCKS
#if ALLOC_SPLIT_PTLOCKS
spinlock_t *ptl;
#else
spinlock_t ptl;
#endif
#endif
struct kmem_cache *slab_cache; /* SL[AU]B: Pointer to slab */
struct page *first_page; /* Compound tail pages */
};
/*
* On machines where all RAM is mapped into kernel address space,
* we can simply calculate the virtual address. On machines with
* highmem some memory is mapped into kernel virtual memory
* dynamically, so we need a place to store that address.
* Note that this field could be 16 bits on x86 ... ;)
*
* Architectures with slow multiplication can define
* WANT_PAGE_VIRTUAL in asm/page.h
*/
#if defined(WANT_PAGE_VIRTUAL)
void *virtual; /* Kernel virtual address (NULL if
not kmapped, ie. highmem) */
#endif /* WANT_PAGE_VIRTUAL */
#ifdef CONFIG_WANT_PAGE_DEBUG_FLAGS
unsigned long debug_flags; /* Use atomic bitops on this */
#endif
#ifdef CONFIG_KMEMCHECK
/*
* kmemcheck wants to track the status of each byte in a page; this
* is a pointer to such a status block. NULL if not tracked.
*/
void *shadow;
#endif
#ifdef LAST_CPUPID_NOT_IN_PAGE_FLAGS
int _last_cpupid;
#endif
}
（该结构很多union结构，主要是用于各种算法不同数据的空间复用，暂时记录部分常见的数据成员）
unsigned long flags;
——用于记录页框的类型；
struct address_space *mapping;
——用于区分该页是映射页框还是匿名页框；
atomic_t _mapcount;
——记录了系统中页表有多少项指向该页；
atomic_t _count;
——当前系统对该页面的引用次数；
struct list_head lru;
——当页框处于分配状态时，该成员用于zone的lruvec里面的list，当页框未被分配时则用于伙伴算法；
unsigned long private;
——指向“私有”数据的指针。根据页的用途，可以用不同的方式使用该指针，通常用于与数据缓冲区关联起来；
void *virtual;
——用于高端内存区域的页，即用于无法直接映射的页，该成员用于存储该页的虚拟地址；