1 /*-------------------------------------------------------------------------
4 * Routines to compute (and set) relation sizes and path costs
6 * Path costs are measured in arbitrary units established by these basic
9 * seq_page_cost Cost of a sequential page fetch
10 * random_page_cost Cost of a non-sequential page fetch
11 * cpu_tuple_cost Cost of typical CPU time to process a tuple
12 * cpu_index_tuple_cost Cost of typical CPU time to process an index tuple
13 * cpu_operator_cost Cost of CPU time to execute an operator or function
15 * We expect that the kernel will typically do some amount of read-ahead
16 * optimization; this in conjunction with seek costs means that seq_page_cost
17 * is normally considerably less than random_page_cost. (However, if the
18 * database is fully cached in RAM, it is reasonable to set them equal.)
20 * We also use a rough estimate "effective_cache_size" of the number of
21 * disk pages in Postgres + OS-level disk cache. (We can't simply use
22 * NBuffers for this purpose because that would ignore the effects of
23 * the kernel's disk cache.)
25 * Obviously, taking constants for these values is an oversimplification,
26 * but it's tough enough to get any useful estimates even at this level of
27 * detail. Note that all of these parameters are user-settable, in case
28 * the default values are drastically off for a particular platform.
30 * We compute two separate costs for each path:
31 * total_cost: total estimated cost to fetch all tuples
32 * startup_cost: cost that is expended before first tuple is fetched
33 * In some scenarios, such as when there is a LIMIT or we are implementing
34 * an EXISTS(...) sub-select, it is not necessary to fetch all tuples of the
35 * path's result. A caller can estimate the cost of fetching a partial
36 * result by interpolating between startup_cost and total_cost. In detail:
37 * actual_cost = startup_cost +
38 * (total_cost - startup_cost) * tuples_to_fetch / path->parent->rows;
39 * Note that a base relation's rows count (and, by extension, plan_rows for
40 * plan nodes below the LIMIT node) are set without regard to any LIMIT, so
41 * that this equation works properly. (Also, these routines guarantee not to
42 * set the rows count to zero, so there will be no zero divide.) The LIMIT is
43 * applied as a top-level plan node.
45 * For largely historical reasons, most of the routines in this module use
46 * the passed result Path only to store their startup_cost and total_cost
47 * results into. All the input data they need is passed as separate
48 * parameters, even though much of it could be extracted from the Path.
49 * An exception is made for the cost_XXXjoin() routines, which expect all
50 * the non-cost fields of the passed XXXPath to be filled in.
53 * Portions Copyright (c) 1996-2008, PostgreSQL Global Development Group
54 * Portions Copyright (c) 1994, Regents of the University of California
57 * $PostgreSQL: pgsql/src/backend/optimizer/path/costsize.c,v 1.196 2008/08/25 22:42:32 tgl Exp $
59 *-------------------------------------------------------------------------
66 #include "executor/nodeHash.h"
67 #include "miscadmin.h"
68 #include "nodes/nodeFuncs.h"
69 #include "optimizer/clauses.h"
70 #include "optimizer/cost.h"
71 #include "optimizer/pathnode.h"
72 #include "optimizer/planmain.h"
73 #include "parser/parsetree.h"
74 #include "utils/lsyscache.h"
75 #include "utils/selfuncs.h"
76 #include "utils/tuplesort.h"
79 #define LOG2(x) (log(x) / 0.693147180559945)
82 * Some Paths return less than the nominal number of rows of their parent
83 * relations; join nodes need to do this to get the correct input count:
85 #define PATH_ROWS(path) \
86 (IsA(path, UniquePath) ? \
87 ((UniquePath *) (path))->rows : \
91 double seq_page_cost = DEFAULT_SEQ_PAGE_COST;
92 double random_page_cost = DEFAULT_RANDOM_PAGE_COST;
93 double cpu_tuple_cost = DEFAULT_CPU_TUPLE_COST;
94 double cpu_index_tuple_cost = DEFAULT_CPU_INDEX_TUPLE_COST;
95 double cpu_operator_cost = DEFAULT_CPU_OPERATOR_COST;
97 int effective_cache_size = DEFAULT_EFFECTIVE_CACHE_SIZE;
99 Cost disable_cost = 100000000.0;
101 bool enable_seqscan = true;
102 bool enable_indexscan = true;
103 bool enable_bitmapscan = true;
104 bool enable_tidscan = true;
105 bool enable_sort = true;
106 bool enable_hashagg = true;
107 bool enable_nestloop = true;
108 bool enable_mergejoin = true;
109 bool enable_hashjoin = true;
115 } cost_qual_eval_context;
117 static MergeScanSelCache *cached_scansel(PlannerInfo *root,
120 static bool cost_qual_eval_walker(Node *node, cost_qual_eval_context *context);
121 static double approx_tuple_count(PlannerInfo *root, JoinPath *path,
122 List *quals, SpecialJoinInfo *sjinfo);
123 static void set_rel_width(PlannerInfo *root, RelOptInfo *rel);
124 static double relation_byte_size(double tuples, int width);
125 static double page_size(double tuples, int width);
130 * Force a row-count estimate to a sane value.
133 clamp_row_est(double nrows)
136 * Force estimate to be at least one row, to make explain output look
137 * better and to avoid possible divide-by-zero when interpolating costs.
138 * Make it an integer, too.
151 * Determines and returns the cost of scanning a relation sequentially.
154 cost_seqscan(Path *path, PlannerInfo *root,
157 Cost startup_cost = 0;
161 /* Should only be applied to base relations */
162 Assert(baserel->relid > 0);
163 Assert(baserel->rtekind == RTE_RELATION);
166 startup_cost += disable_cost;
171 run_cost += seq_page_cost * baserel->pages;
174 startup_cost += baserel->baserestrictcost.startup;
175 cpu_per_tuple = cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
176 run_cost += cpu_per_tuple * baserel->tuples;
178 path->startup_cost = startup_cost;
179 path->total_cost = startup_cost + run_cost;
184 * Determines and returns the cost of scanning a relation using an index.
186 * 'index' is the index to be used
187 * 'indexQuals' is the list of applicable qual clauses (implicit AND semantics)
188 * 'outer_rel' is the outer relation when we are considering using the index
189 * scan as the inside of a nestloop join (hence, some of the indexQuals
190 * are join clauses, and we should expect repeated scans of the index);
191 * NULL for a plain index scan
193 * cost_index() takes an IndexPath not just a Path, because it sets a few
194 * additional fields of the IndexPath besides startup_cost and total_cost.
195 * These fields are needed if the IndexPath is used in a BitmapIndexScan.
197 * NOTE: 'indexQuals' must contain only clauses usable as index restrictions.
198 * Any additional quals evaluated as qpquals may reduce the number of returned
199 * tuples, but they won't reduce the number of tuples we have to fetch from
200 * the table, so they don't reduce the scan cost.
202 * NOTE: as of 8.0, indexQuals is a list of RestrictInfo nodes, where formerly
203 * it was a list of bare clause expressions.
206 cost_index(IndexPath *path, PlannerInfo *root,
209 RelOptInfo *outer_rel)
211 RelOptInfo *baserel = index->rel;
212 Cost startup_cost = 0;
214 Cost indexStartupCost;
216 Selectivity indexSelectivity;
217 double indexCorrelation,
222 double tuples_fetched;
223 double pages_fetched;
225 /* Should only be applied to base relations */
226 Assert(IsA(baserel, RelOptInfo) &&
227 IsA(index, IndexOptInfo));
228 Assert(baserel->relid > 0);
229 Assert(baserel->rtekind == RTE_RELATION);
231 if (!enable_indexscan)
232 startup_cost += disable_cost;
235 * Call index-access-method-specific code to estimate the processing cost
236 * for scanning the index, as well as the selectivity of the index (ie,
237 * the fraction of main-table tuples we will have to retrieve) and its
238 * correlation to the main-table tuple order.
240 OidFunctionCall8(index->amcostestimate,
241 PointerGetDatum(root),
242 PointerGetDatum(index),
243 PointerGetDatum(indexQuals),
244 PointerGetDatum(outer_rel),
245 PointerGetDatum(&indexStartupCost),
246 PointerGetDatum(&indexTotalCost),
247 PointerGetDatum(&indexSelectivity),
248 PointerGetDatum(&indexCorrelation));
251 * Save amcostestimate's results for possible use in bitmap scan planning.
252 * We don't bother to save indexStartupCost or indexCorrelation, because a
253 * bitmap scan doesn't care about either.
255 path->indextotalcost = indexTotalCost;
256 path->indexselectivity = indexSelectivity;
258 /* all costs for touching index itself included here */
259 startup_cost += indexStartupCost;
260 run_cost += indexTotalCost - indexStartupCost;
262 /* estimate number of main-table tuples fetched */
263 tuples_fetched = clamp_row_est(indexSelectivity * baserel->tuples);
266 * Estimate number of main-table pages fetched, and compute I/O cost.
268 * When the index ordering is uncorrelated with the table ordering,
269 * we use an approximation proposed by Mackert and Lohman (see
270 * index_pages_fetched() for details) to compute the number of pages
271 * fetched, and then charge random_page_cost per page fetched.
273 * When the index ordering is exactly correlated with the table ordering
274 * (just after a CLUSTER, for example), the number of pages fetched should
275 * be exactly selectivity * table_size. What's more, all but the first
276 * will be sequential fetches, not the random fetches that occur in the
277 * uncorrelated case. So if the number of pages is more than 1, we
279 * random_page_cost + (pages_fetched - 1) * seq_page_cost
280 * For partially-correlated indexes, we ought to charge somewhere between
281 * these two estimates. We currently interpolate linearly between the
282 * estimates based on the correlation squared (XXX is that appropriate?).
285 if (outer_rel != NULL && outer_rel->rows > 1)
288 * For repeated indexscans, the appropriate estimate for the
289 * uncorrelated case is to scale up the number of tuples fetched in
290 * the Mackert and Lohman formula by the number of scans, so that we
291 * estimate the number of pages fetched by all the scans; then
292 * pro-rate the costs for one scan. In this case we assume all the
293 * fetches are random accesses.
295 double num_scans = outer_rel->rows;
297 pages_fetched = index_pages_fetched(tuples_fetched * num_scans,
299 (double) index->pages,
302 max_IO_cost = (pages_fetched * random_page_cost) / num_scans;
305 * In the perfectly correlated case, the number of pages touched by
306 * each scan is selectivity * table_size, and we can use the Mackert
307 * and Lohman formula at the page level to estimate how much work is
308 * saved by caching across scans. We still assume all the fetches are
309 * random, though, which is an overestimate that's hard to correct for
310 * without double-counting the cache effects. (But in most cases
311 * where such a plan is actually interesting, only one page would get
312 * fetched per scan anyway, so it shouldn't matter much.)
314 pages_fetched = ceil(indexSelectivity * (double) baserel->pages);
316 pages_fetched = index_pages_fetched(pages_fetched * num_scans,
318 (double) index->pages,
321 min_IO_cost = (pages_fetched * random_page_cost) / num_scans;
326 * Normal case: apply the Mackert and Lohman formula, and then
327 * interpolate between that and the correlation-derived result.
329 pages_fetched = index_pages_fetched(tuples_fetched,
331 (double) index->pages,
334 /* max_IO_cost is for the perfectly uncorrelated case (csquared=0) */
335 max_IO_cost = pages_fetched * random_page_cost;
337 /* min_IO_cost is for the perfectly correlated case (csquared=1) */
338 pages_fetched = ceil(indexSelectivity * (double) baserel->pages);
339 min_IO_cost = random_page_cost;
340 if (pages_fetched > 1)
341 min_IO_cost += (pages_fetched - 1) * seq_page_cost;
345 * Now interpolate based on estimated index order correlation to get total
346 * disk I/O cost for main table accesses.
348 csquared = indexCorrelation * indexCorrelation;
350 run_cost += max_IO_cost + csquared * (min_IO_cost - max_IO_cost);
353 * Estimate CPU costs per tuple.
355 * Normally the indexquals will be removed from the list of restriction
356 * clauses that we have to evaluate as qpquals, so we should subtract
357 * their costs from baserestrictcost. But if we are doing a join then
358 * some of the indexquals are join clauses and shouldn't be subtracted.
359 * Rather than work out exactly how much to subtract, we don't subtract
362 startup_cost += baserel->baserestrictcost.startup;
363 cpu_per_tuple = cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
365 if (outer_rel == NULL)
367 QualCost index_qual_cost;
369 cost_qual_eval(&index_qual_cost, indexQuals, root);
370 /* any startup cost still has to be paid ... */
371 cpu_per_tuple -= index_qual_cost.per_tuple;
374 run_cost += cpu_per_tuple * tuples_fetched;
376 path->path.startup_cost = startup_cost;
377 path->path.total_cost = startup_cost + run_cost;
381 * index_pages_fetched
382 * Estimate the number of pages actually fetched after accounting for
385 * We use an approximation proposed by Mackert and Lohman, "Index Scans
386 * Using a Finite LRU Buffer: A Validated I/O Model", ACM Transactions
387 * on Database Systems, Vol. 14, No. 3, September 1989, Pages 401-424.
388 * The Mackert and Lohman approximation is that the number of pages
391 * min(2TNs/(2T+Ns), T) when T <= b
392 * 2TNs/(2T+Ns) when T > b and Ns <= 2Tb/(2T-b)
393 * b + (Ns - 2Tb/(2T-b))*(T-b)/T when T > b and Ns > 2Tb/(2T-b)
395 * T = # pages in table
396 * N = # tuples in table
397 * s = selectivity = fraction of table to be scanned
398 * b = # buffer pages available (we include kernel space here)
400 * We assume that effective_cache_size is the total number of buffer pages
401 * available for the whole query, and pro-rate that space across all the
402 * tables in the query and the index currently under consideration. (This
403 * ignores space needed for other indexes used by the query, but since we
404 * don't know which indexes will get used, we can't estimate that very well;
405 * and in any case counting all the tables may well be an overestimate, since
406 * depending on the join plan not all the tables may be scanned concurrently.)
408 * The product Ns is the number of tuples fetched; we pass in that
409 * product rather than calculating it here. "pages" is the number of pages
410 * in the object under consideration (either an index or a table).
411 * "index_pages" is the amount to add to the total table space, which was
412 * computed for us by query_planner.
414 * Caller is expected to have ensured that tuples_fetched is greater than zero
415 * and rounded to integer (see clamp_row_est). The result will likewise be
416 * greater than zero and integral.
419 index_pages_fetched(double tuples_fetched, BlockNumber pages,
420 double index_pages, PlannerInfo *root)
422 double pages_fetched;
427 /* T is # pages in table, but don't allow it to be zero */
428 T = (pages > 1) ? (double) pages : 1.0;
430 /* Compute number of pages assumed to be competing for cache space */
431 total_pages = root->total_table_pages + index_pages;
432 total_pages = Max(total_pages, 1.0);
433 Assert(T <= total_pages);
435 /* b is pro-rated share of effective_cache_size */
436 b = (double) effective_cache_size *T / total_pages;
438 /* force it positive and integral */
444 /* This part is the Mackert and Lohman formula */
448 (2.0 * T * tuples_fetched) / (2.0 * T + tuples_fetched);
449 if (pages_fetched >= T)
452 pages_fetched = ceil(pages_fetched);
458 lim = (2.0 * T * b) / (2.0 * T - b);
459 if (tuples_fetched <= lim)
462 (2.0 * T * tuples_fetched) / (2.0 * T + tuples_fetched);
467 b + (tuples_fetched - lim) * (T - b) / T;
469 pages_fetched = ceil(pages_fetched);
471 return pages_fetched;
475 * get_indexpath_pages
476 * Determine the total size of the indexes used in a bitmap index path.
478 * Note: if the same index is used more than once in a bitmap tree, we will
479 * count it multiple times, which perhaps is the wrong thing ... but it's
480 * not completely clear, and detecting duplicates is difficult, so ignore it
484 get_indexpath_pages(Path *bitmapqual)
489 if (IsA(bitmapqual, BitmapAndPath))
491 BitmapAndPath *apath = (BitmapAndPath *) bitmapqual;
493 foreach(l, apath->bitmapquals)
495 result += get_indexpath_pages((Path *) lfirst(l));
498 else if (IsA(bitmapqual, BitmapOrPath))
500 BitmapOrPath *opath = (BitmapOrPath *) bitmapqual;
502 foreach(l, opath->bitmapquals)
504 result += get_indexpath_pages((Path *) lfirst(l));
507 else if (IsA(bitmapqual, IndexPath))
509 IndexPath *ipath = (IndexPath *) bitmapqual;
511 result = (double) ipath->indexinfo->pages;
514 elog(ERROR, "unrecognized node type: %d", nodeTag(bitmapqual));
520 * cost_bitmap_heap_scan
521 * Determines and returns the cost of scanning a relation using a bitmap
522 * index-then-heap plan.
524 * 'baserel' is the relation to be scanned
525 * 'bitmapqual' is a tree of IndexPaths, BitmapAndPaths, and BitmapOrPaths
526 * 'outer_rel' is the outer relation when we are considering using the bitmap
527 * scan as the inside of a nestloop join (hence, some of the indexQuals
528 * are join clauses, and we should expect repeated scans of the table);
529 * NULL for a plain bitmap scan
531 * Note: if this is a join inner path, the component IndexPaths in bitmapqual
532 * should have been costed accordingly.
535 cost_bitmap_heap_scan(Path *path, PlannerInfo *root, RelOptInfo *baserel,
536 Path *bitmapqual, RelOptInfo *outer_rel)
538 Cost startup_cost = 0;
541 Selectivity indexSelectivity;
544 double tuples_fetched;
545 double pages_fetched;
548 /* Should only be applied to base relations */
549 Assert(IsA(baserel, RelOptInfo));
550 Assert(baserel->relid > 0);
551 Assert(baserel->rtekind == RTE_RELATION);
553 if (!enable_bitmapscan)
554 startup_cost += disable_cost;
557 * Fetch total cost of obtaining the bitmap, as well as its total
560 cost_bitmap_tree_node(bitmapqual, &indexTotalCost, &indexSelectivity);
562 startup_cost += indexTotalCost;
565 * Estimate number of main-table pages fetched.
567 tuples_fetched = clamp_row_est(indexSelectivity * baserel->tuples);
569 T = (baserel->pages > 1) ? (double) baserel->pages : 1.0;
571 if (outer_rel != NULL && outer_rel->rows > 1)
574 * For repeated bitmap scans, scale up the number of tuples fetched in
575 * the Mackert and Lohman formula by the number of scans, so that we
576 * estimate the number of pages fetched by all the scans. Then
577 * pro-rate for one scan.
579 double num_scans = outer_rel->rows;
581 pages_fetched = index_pages_fetched(tuples_fetched * num_scans,
583 get_indexpath_pages(bitmapqual),
585 pages_fetched /= num_scans;
590 * For a single scan, the number of heap pages that need to be fetched
591 * is the same as the Mackert and Lohman formula for the case T <= b
592 * (ie, no re-reads needed).
594 pages_fetched = (2.0 * T * tuples_fetched) / (2.0 * T + tuples_fetched);
596 if (pages_fetched >= T)
599 pages_fetched = ceil(pages_fetched);
602 * For small numbers of pages we should charge random_page_cost apiece,
603 * while if nearly all the table's pages are being read, it's more
604 * appropriate to charge seq_page_cost apiece. The effect is nonlinear,
605 * too. For lack of a better idea, interpolate like this to determine the
608 if (pages_fetched >= 2.0)
609 cost_per_page = random_page_cost -
610 (random_page_cost - seq_page_cost) * sqrt(pages_fetched / T);
612 cost_per_page = random_page_cost;
614 run_cost += pages_fetched * cost_per_page;
617 * Estimate CPU costs per tuple.
619 * Often the indexquals don't need to be rechecked at each tuple ... but
620 * not always, especially not if there are enough tuples involved that the
621 * bitmaps become lossy. For the moment, just assume they will be
624 startup_cost += baserel->baserestrictcost.startup;
625 cpu_per_tuple = cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
627 run_cost += cpu_per_tuple * tuples_fetched;
629 path->startup_cost = startup_cost;
630 path->total_cost = startup_cost + run_cost;
634 * cost_bitmap_tree_node
635 * Extract cost and selectivity from a bitmap tree node (index/and/or)
638 cost_bitmap_tree_node(Path *path, Cost *cost, Selectivity *selec)
640 if (IsA(path, IndexPath))
642 *cost = ((IndexPath *) path)->indextotalcost;
643 *selec = ((IndexPath *) path)->indexselectivity;
646 * Charge a small amount per retrieved tuple to reflect the costs of
647 * manipulating the bitmap. This is mostly to make sure that a bitmap
648 * scan doesn't look to be the same cost as an indexscan to retrieve a
651 *cost += 0.1 * cpu_operator_cost * ((IndexPath *) path)->rows;
653 else if (IsA(path, BitmapAndPath))
655 *cost = path->total_cost;
656 *selec = ((BitmapAndPath *) path)->bitmapselectivity;
658 else if (IsA(path, BitmapOrPath))
660 *cost = path->total_cost;
661 *selec = ((BitmapOrPath *) path)->bitmapselectivity;
665 elog(ERROR, "unrecognized node type: %d", nodeTag(path));
666 *cost = *selec = 0; /* keep compiler quiet */
671 * cost_bitmap_and_node
672 * Estimate the cost of a BitmapAnd node
674 * Note that this considers only the costs of index scanning and bitmap
675 * creation, not the eventual heap access. In that sense the object isn't
676 * truly a Path, but it has enough path-like properties (costs in particular)
677 * to warrant treating it as one.
680 cost_bitmap_and_node(BitmapAndPath *path, PlannerInfo *root)
687 * We estimate AND selectivity on the assumption that the inputs are
688 * independent. This is probably often wrong, but we don't have the info
691 * The runtime cost of the BitmapAnd itself is estimated at 100x
692 * cpu_operator_cost for each tbm_intersect needed. Probably too small,
693 * definitely too simplistic?
697 foreach(l, path->bitmapquals)
699 Path *subpath = (Path *) lfirst(l);
701 Selectivity subselec;
703 cost_bitmap_tree_node(subpath, &subCost, &subselec);
707 totalCost += subCost;
708 if (l != list_head(path->bitmapquals))
709 totalCost += 100.0 * cpu_operator_cost;
711 path->bitmapselectivity = selec;
712 path->path.startup_cost = totalCost;
713 path->path.total_cost = totalCost;
717 * cost_bitmap_or_node
718 * Estimate the cost of a BitmapOr node
720 * See comments for cost_bitmap_and_node.
723 cost_bitmap_or_node(BitmapOrPath *path, PlannerInfo *root)
730 * We estimate OR selectivity on the assumption that the inputs are
731 * non-overlapping, since that's often the case in "x IN (list)" type
732 * situations. Of course, we clamp to 1.0 at the end.
734 * The runtime cost of the BitmapOr itself is estimated at 100x
735 * cpu_operator_cost for each tbm_union needed. Probably too small,
736 * definitely too simplistic? We are aware that the tbm_unions are
737 * optimized out when the inputs are BitmapIndexScans.
741 foreach(l, path->bitmapquals)
743 Path *subpath = (Path *) lfirst(l);
745 Selectivity subselec;
747 cost_bitmap_tree_node(subpath, &subCost, &subselec);
751 totalCost += subCost;
752 if (l != list_head(path->bitmapquals) &&
753 !IsA(subpath, IndexPath))
754 totalCost += 100.0 * cpu_operator_cost;
756 path->bitmapselectivity = Min(selec, 1.0);
757 path->path.startup_cost = totalCost;
758 path->path.total_cost = totalCost;
763 * Determines and returns the cost of scanning a relation using TIDs.
766 cost_tidscan(Path *path, PlannerInfo *root,
767 RelOptInfo *baserel, List *tidquals)
769 Cost startup_cost = 0;
771 bool isCurrentOf = false;
773 QualCost tid_qual_cost;
777 /* Should only be applied to base relations */
778 Assert(baserel->relid > 0);
779 Assert(baserel->rtekind == RTE_RELATION);
781 /* Count how many tuples we expect to retrieve */
785 if (IsA(lfirst(l), ScalarArrayOpExpr))
787 /* Each element of the array yields 1 tuple */
788 ScalarArrayOpExpr *saop = (ScalarArrayOpExpr *) lfirst(l);
789 Node *arraynode = (Node *) lsecond(saop->args);
791 ntuples += estimate_array_length(arraynode);
793 else if (IsA(lfirst(l), CurrentOfExpr))
795 /* CURRENT OF yields 1 tuple */
801 /* It's just CTID = something, count 1 tuple */
807 * We must force TID scan for WHERE CURRENT OF, because only nodeTidscan.c
808 * understands how to do it correctly. Therefore, honor enable_tidscan
809 * only when CURRENT OF isn't present. Also note that cost_qual_eval
810 * counts a CurrentOfExpr as having startup cost disable_cost, which we
811 * subtract off here; that's to prevent other plan types such as seqscan
816 Assert(baserel->baserestrictcost.startup >= disable_cost);
817 startup_cost -= disable_cost;
819 else if (!enable_tidscan)
820 startup_cost += disable_cost;
823 * The TID qual expressions will be computed once, any other baserestrict
824 * quals once per retrived tuple.
826 cost_qual_eval(&tid_qual_cost, tidquals, root);
828 /* disk costs --- assume each tuple on a different page */
829 run_cost += random_page_cost * ntuples;
832 startup_cost += baserel->baserestrictcost.startup +
833 tid_qual_cost.per_tuple;
834 cpu_per_tuple = cpu_tuple_cost + baserel->baserestrictcost.per_tuple -
835 tid_qual_cost.per_tuple;
836 run_cost += cpu_per_tuple * ntuples;
838 path->startup_cost = startup_cost;
839 path->total_cost = startup_cost + run_cost;
844 * Determines and returns the cost of scanning a subquery RTE.
847 cost_subqueryscan(Path *path, RelOptInfo *baserel)
853 /* Should only be applied to base relations that are subqueries */
854 Assert(baserel->relid > 0);
855 Assert(baserel->rtekind == RTE_SUBQUERY);
858 * Cost of path is cost of evaluating the subplan, plus cost of evaluating
859 * any restriction clauses that will be attached to the SubqueryScan node,
860 * plus cpu_tuple_cost to account for selection and projection overhead.
862 path->startup_cost = baserel->subplan->startup_cost;
863 path->total_cost = baserel->subplan->total_cost;
865 startup_cost = baserel->baserestrictcost.startup;
866 cpu_per_tuple = cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
867 run_cost = cpu_per_tuple * baserel->tuples;
869 path->startup_cost += startup_cost;
870 path->total_cost += startup_cost + run_cost;
875 * Determines and returns the cost of scanning a function RTE.
878 cost_functionscan(Path *path, PlannerInfo *root, RelOptInfo *baserel)
880 Cost startup_cost = 0;
886 /* Should only be applied to base relations that are functions */
887 Assert(baserel->relid > 0);
888 rte = planner_rt_fetch(baserel->relid, root);
889 Assert(rte->rtekind == RTE_FUNCTION);
891 /* Estimate costs of executing the function expression */
892 cost_qual_eval_node(&exprcost, rte->funcexpr, root);
894 startup_cost += exprcost.startup;
895 cpu_per_tuple = exprcost.per_tuple;
897 /* Add scanning CPU costs */
898 startup_cost += baserel->baserestrictcost.startup;
899 cpu_per_tuple += cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
900 run_cost += cpu_per_tuple * baserel->tuples;
902 path->startup_cost = startup_cost;
903 path->total_cost = startup_cost + run_cost;
908 * Determines and returns the cost of scanning a VALUES RTE.
911 cost_valuesscan(Path *path, PlannerInfo *root, RelOptInfo *baserel)
913 Cost startup_cost = 0;
917 /* Should only be applied to base relations that are values lists */
918 Assert(baserel->relid > 0);
919 Assert(baserel->rtekind == RTE_VALUES);
922 * For now, estimate list evaluation cost at one operator eval per list
923 * (probably pretty bogus, but is it worth being smarter?)
925 cpu_per_tuple = cpu_operator_cost;
927 /* Add scanning CPU costs */
928 startup_cost += baserel->baserestrictcost.startup;
929 cpu_per_tuple += cpu_tuple_cost + baserel->baserestrictcost.per_tuple;
930 run_cost += cpu_per_tuple * baserel->tuples;
932 path->startup_cost = startup_cost;
933 path->total_cost = startup_cost + run_cost;
938 * Determines and returns the cost of sorting a relation, including
939 * the cost of reading the input data.
941 * If the total volume of data to sort is less than work_mem, we will do
942 * an in-memory sort, which requires no I/O and about t*log2(t) tuple
943 * comparisons for t tuples.
945 * If the total volume exceeds work_mem, we switch to a tape-style merge
946 * algorithm. There will still be about t*log2(t) tuple comparisons in
947 * total, but we will also need to write and read each tuple once per
948 * merge pass. We expect about ceil(logM(r)) merge passes where r is the
949 * number of initial runs formed and M is the merge order used by tuplesort.c.
950 * Since the average initial run should be about twice work_mem, we have
951 * disk traffic = 2 * relsize * ceil(logM(p / (2*work_mem)))
952 * cpu = comparison_cost * t * log2(t)
954 * If the sort is bounded (i.e., only the first k result tuples are needed)
955 * and k tuples can fit into work_mem, we use a heap method that keeps only
956 * k tuples in the heap; this will require about t*log2(k) tuple comparisons.
958 * The disk traffic is assumed to be 3/4ths sequential and 1/4th random
959 * accesses (XXX can't we refine that guess?)
961 * We charge two operator evals per tuple comparison, which should be in
962 * the right ballpark in most cases.
964 * 'pathkeys' is a list of sort keys
965 * 'input_cost' is the total cost for reading the input data
966 * 'tuples' is the number of tuples in the relation
967 * 'width' is the average tuple width in bytes
968 * 'limit_tuples' is the bound on the number of output tuples; -1 if no bound
970 * NOTE: some callers currently pass NIL for pathkeys because they
971 * can't conveniently supply the sort keys. Since this routine doesn't
972 * currently do anything with pathkeys anyway, that doesn't matter...
973 * but if it ever does, it should react gracefully to lack of key data.
974 * (Actually, the thing we'd most likely be interested in is just the number
975 * of sort keys, which all callers *could* supply.)
978 cost_sort(Path *path, PlannerInfo *root,
979 List *pathkeys, Cost input_cost, double tuples, int width,
982 Cost startup_cost = input_cost;
984 double input_bytes = relation_byte_size(tuples, width);
986 double output_tuples;
987 long work_mem_bytes = work_mem * 1024L;
990 startup_cost += disable_cost;
993 * We want to be sure the cost of a sort is never estimated as zero, even
994 * if passed-in tuple count is zero. Besides, mustn't do log(0)...
999 /* Do we have a useful LIMIT? */
1000 if (limit_tuples > 0 && limit_tuples < tuples)
1002 output_tuples = limit_tuples;
1003 output_bytes = relation_byte_size(output_tuples, width);
1007 output_tuples = tuples;
1008 output_bytes = input_bytes;
1011 if (output_bytes > work_mem_bytes)
1014 * We'll have to use a disk-based sort of all the tuples
1016 double npages = ceil(input_bytes / BLCKSZ);
1017 double nruns = (input_bytes / work_mem_bytes) * 0.5;
1018 double mergeorder = tuplesort_merge_order(work_mem_bytes);
1020 double npageaccesses;
1025 * Assume about two operator evals per tuple comparison and N log2 N
1028 startup_cost += 2.0 * cpu_operator_cost * tuples * LOG2(tuples);
1032 /* Compute logM(r) as log(r) / log(M) */
1033 if (nruns > mergeorder)
1034 log_runs = ceil(log(nruns) / log(mergeorder));
1037 npageaccesses = 2.0 * npages * log_runs;
1038 /* Assume 3/4ths of accesses are sequential, 1/4th are not */
1039 startup_cost += npageaccesses *
1040 (seq_page_cost * 0.75 + random_page_cost * 0.25);
1042 else if (tuples > 2 * output_tuples || input_bytes > work_mem_bytes)
1045 * We'll use a bounded heap-sort keeping just K tuples in memory, for
1046 * a total number of tuple comparisons of N log2 K; but the constant
1047 * factor is a bit higher than for quicksort. Tweak it so that the
1048 * cost curve is continuous at the crossover point.
1050 startup_cost += 2.0 * cpu_operator_cost * tuples * LOG2(2.0 * output_tuples);
1054 /* We'll use plain quicksort on all the input tuples */
1055 startup_cost += 2.0 * cpu_operator_cost * tuples * LOG2(tuples);
1059 * Also charge a small amount (arbitrarily set equal to operator cost) per
1060 * extracted tuple. Note it's correct to use tuples not output_tuples
1061 * here --- the upper LIMIT will pro-rate the run cost so we'd be double
1062 * counting the LIMIT otherwise.
1064 run_cost += cpu_operator_cost * tuples;
1066 path->startup_cost = startup_cost;
1067 path->total_cost = startup_cost + run_cost;
1071 * sort_exceeds_work_mem
1072 * Given a finished Sort plan node, detect whether it is expected to
1073 * spill to disk (ie, will need more than work_mem workspace)
1075 * This assumes there will be no available LIMIT.
1078 sort_exceeds_work_mem(Sort *sort)
1080 double input_bytes = relation_byte_size(sort->plan.plan_rows,
1081 sort->plan.plan_width);
1082 long work_mem_bytes = work_mem * 1024L;
1084 return (input_bytes > work_mem_bytes);
1089 * Determines and returns the cost of materializing a relation, including
1090 * the cost of reading the input data.
1092 * If the total volume of data to materialize exceeds work_mem, we will need
1093 * to write it to disk, so the cost is much higher in that case.
1096 cost_material(Path *path,
1097 Cost input_cost, double tuples, int width)
1099 Cost startup_cost = input_cost;
1101 double nbytes = relation_byte_size(tuples, width);
1102 long work_mem_bytes = work_mem * 1024L;
1105 if (nbytes > work_mem_bytes)
1107 double npages = ceil(nbytes / BLCKSZ);
1109 /* We'll write during startup and read during retrieval */
1110 startup_cost += seq_page_cost * npages;
1111 run_cost += seq_page_cost * npages;
1115 * Charge a very small amount per inserted tuple, to reflect bookkeeping
1116 * costs. We use cpu_tuple_cost/10 for this. This is needed to break the
1117 * tie that would otherwise exist between nestloop with A outer,
1118 * materialized B inner and nestloop with B outer, materialized A inner.
1119 * The extra cost ensures we'll prefer materializing the smaller rel.
1121 startup_cost += cpu_tuple_cost * 0.1 * tuples;
1124 * Also charge a small amount per extracted tuple. We use cpu_tuple_cost
1125 * so that it doesn't appear worthwhile to materialize a bare seqscan.
1127 run_cost += cpu_tuple_cost * tuples;
1129 path->startup_cost = startup_cost;
1130 path->total_cost = startup_cost + run_cost;
1135 * Determines and returns the cost of performing an Agg plan node,
1136 * including the cost of its input.
1138 * Note: when aggstrategy == AGG_SORTED, caller must ensure that input costs
1139 * are for appropriately-sorted input.
1142 cost_agg(Path *path, PlannerInfo *root,
1143 AggStrategy aggstrategy, int numAggs,
1144 int numGroupCols, double numGroups,
1145 Cost input_startup_cost, Cost input_total_cost,
1146 double input_tuples)
1152 * We charge one cpu_operator_cost per aggregate function per input tuple,
1153 * and another one per output tuple (corresponding to transfn and finalfn
1154 * calls respectively). If we are grouping, we charge an additional
1155 * cpu_operator_cost per grouping column per input tuple for grouping
1158 * We will produce a single output tuple if not grouping, and a tuple per
1159 * group otherwise. We charge cpu_tuple_cost for each output tuple.
1161 * Note: in this cost model, AGG_SORTED and AGG_HASHED have exactly the
1162 * same total CPU cost, but AGG_SORTED has lower startup cost. If the
1163 * input path is already sorted appropriately, AGG_SORTED should be
1164 * preferred (since it has no risk of memory overflow). This will happen
1165 * as long as the computed total costs are indeed exactly equal --- but if
1166 * there's roundoff error we might do the wrong thing. So be sure that
1167 * the computations below form the same intermediate values in the same
1170 * Note: ideally we should use the pg_proc.procost costs of each
1171 * aggregate's component functions, but for now that seems like an
1172 * excessive amount of work.
1174 if (aggstrategy == AGG_PLAIN)
1176 startup_cost = input_total_cost;
1177 startup_cost += cpu_operator_cost * (input_tuples + 1) * numAggs;
1178 /* we aren't grouping */
1179 total_cost = startup_cost + cpu_tuple_cost;
1181 else if (aggstrategy == AGG_SORTED)
1183 /* Here we are able to deliver output on-the-fly */
1184 startup_cost = input_startup_cost;
1185 total_cost = input_total_cost;
1186 /* calcs phrased this way to match HASHED case, see note above */
1187 total_cost += cpu_operator_cost * input_tuples * numGroupCols;
1188 total_cost += cpu_operator_cost * input_tuples * numAggs;
1189 total_cost += cpu_operator_cost * numGroups * numAggs;
1190 total_cost += cpu_tuple_cost * numGroups;
1194 /* must be AGG_HASHED */
1195 startup_cost = input_total_cost;
1196 startup_cost += cpu_operator_cost * input_tuples * numGroupCols;
1197 startup_cost += cpu_operator_cost * input_tuples * numAggs;
1198 total_cost = startup_cost;
1199 total_cost += cpu_operator_cost * numGroups * numAggs;
1200 total_cost += cpu_tuple_cost * numGroups;
1203 path->startup_cost = startup_cost;
1204 path->total_cost = total_cost;
1209 * Determines and returns the cost of performing a Group plan node,
1210 * including the cost of its input.
1212 * Note: caller must ensure that input costs are for appropriately-sorted
1216 cost_group(Path *path, PlannerInfo *root,
1217 int numGroupCols, double numGroups,
1218 Cost input_startup_cost, Cost input_total_cost,
1219 double input_tuples)
1224 startup_cost = input_startup_cost;
1225 total_cost = input_total_cost;
1228 * Charge one cpu_operator_cost per comparison per input tuple. We assume
1229 * all columns get compared at most of the tuples.
1231 total_cost += cpu_operator_cost * input_tuples * numGroupCols;
1233 path->startup_cost = startup_cost;
1234 path->total_cost = total_cost;
1238 * If a nestloop's inner path is an indexscan, be sure to use its estimated
1239 * output row count, which may be lower than the restriction-clause-only row
1240 * count of its parent. (We don't include this case in the PATH_ROWS macro
1241 * because it applies *only* to a nestloop's inner relation.) We have to
1242 * be prepared to recurse through Append nodes in case of an appendrel.
1245 nestloop_inner_path_rows(Path *path)
1249 if (IsA(path, IndexPath))
1250 result = ((IndexPath *) path)->rows;
1251 else if (IsA(path, BitmapHeapPath))
1252 result = ((BitmapHeapPath *) path)->rows;
1253 else if (IsA(path, AppendPath))
1258 foreach(l, ((AppendPath *) path)->subpaths)
1260 result += nestloop_inner_path_rows((Path *) lfirst(l));
1264 result = PATH_ROWS(path);
1271 * Determines and returns the cost of joining two relations using the
1272 * nested loop algorithm.
1274 * 'path' is already filled in except for the cost fields
1275 * 'sjinfo' is extra info about the join for selectivity estimation
1278 cost_nestloop(NestPath *path, PlannerInfo *root, SpecialJoinInfo *sjinfo)
1280 Path *outer_path = path->outerjoinpath;
1281 Path *inner_path = path->innerjoinpath;
1282 Cost startup_cost = 0;
1285 QualCost restrict_qual_cost;
1286 double outer_path_rows = PATH_ROWS(outer_path);
1287 double inner_path_rows = nestloop_inner_path_rows(inner_path);
1290 if (!enable_nestloop)
1291 startup_cost += disable_cost;
1293 /* cost of source data */
1296 * NOTE: clearly, we must pay both outer and inner paths' startup_cost
1297 * before we can start returning tuples, so the join's startup cost is
1298 * their sum. What's not so clear is whether the inner path's
1299 * startup_cost must be paid again on each rescan of the inner path. This
1300 * is not true if the inner path is materialized or is a hashjoin, but
1301 * probably is true otherwise.
1303 startup_cost += outer_path->startup_cost + inner_path->startup_cost;
1304 run_cost += outer_path->total_cost - outer_path->startup_cost;
1305 if (IsA(inner_path, MaterialPath) ||
1306 IsA(inner_path, HashPath))
1308 /* charge only run cost for each iteration of inner path */
1313 * charge startup cost for each iteration of inner path, except we
1314 * already charged the first startup_cost in our own startup
1316 run_cost += (outer_path_rows - 1) * inner_path->startup_cost;
1318 run_cost += outer_path_rows *
1319 (inner_path->total_cost - inner_path->startup_cost);
1322 * Compute number of tuples processed (not number emitted!)
1324 ntuples = outer_path_rows * inner_path_rows;
1327 cost_qual_eval(&restrict_qual_cost, path->joinrestrictinfo, root);
1328 startup_cost += restrict_qual_cost.startup;
1329 cpu_per_tuple = cpu_tuple_cost + restrict_qual_cost.per_tuple;
1330 run_cost += cpu_per_tuple * ntuples;
1332 path->path.startup_cost = startup_cost;
1333 path->path.total_cost = startup_cost + run_cost;
1338 * Determines and returns the cost of joining two relations using the
1339 * merge join algorithm.
1341 * 'path' is already filled in except for the cost fields
1342 * 'sjinfo' is extra info about the join for selectivity estimation
1344 * Notes: path's mergeclauses should be a subset of the joinrestrictinfo list;
1345 * outersortkeys and innersortkeys are lists of the keys to be used
1346 * to sort the outer and inner relations, or NIL if no explicit
1347 * sort is needed because the source path is already ordered.
1350 cost_mergejoin(MergePath *path, PlannerInfo *root, SpecialJoinInfo *sjinfo)
1352 Path *outer_path = path->jpath.outerjoinpath;
1353 Path *inner_path = path->jpath.innerjoinpath;
1354 List *mergeclauses = path->path_mergeclauses;
1355 List *outersortkeys = path->outersortkeys;
1356 List *innersortkeys = path->innersortkeys;
1357 Cost startup_cost = 0;
1360 QualCost merge_qual_cost;
1361 QualCost qp_qual_cost;
1362 double outer_path_rows = PATH_ROWS(outer_path);
1363 double inner_path_rows = PATH_ROWS(inner_path);
1368 double mergejointuples,
1371 Selectivity outerstartsel,
1375 Path sort_path; /* dummy for result of cost_sort */
1377 /* Protect some assumptions below that rowcounts aren't zero */
1378 if (outer_path_rows <= 0)
1379 outer_path_rows = 1;
1380 if (inner_path_rows <= 0)
1381 inner_path_rows = 1;
1383 if (!enable_mergejoin)
1384 startup_cost += disable_cost;
1387 * Compute cost of the mergequals and qpquals (other restriction clauses)
1390 cost_qual_eval(&merge_qual_cost, mergeclauses, root);
1391 cost_qual_eval(&qp_qual_cost, path->jpath.joinrestrictinfo, root);
1392 qp_qual_cost.startup -= merge_qual_cost.startup;
1393 qp_qual_cost.per_tuple -= merge_qual_cost.per_tuple;
1396 * Get approx # tuples passing the mergequals. We use approx_tuple_count
1397 * here for speed --- in most cases, any errors won't affect the result
1400 mergejointuples = approx_tuple_count(root, &path->jpath,
1401 mergeclauses, sjinfo);
1404 * When there are equal merge keys in the outer relation, the mergejoin
1405 * must rescan any matching tuples in the inner relation. This means
1406 * re-fetching inner tuples. Our cost model for this is that a re-fetch
1407 * costs the same as an original fetch, which is probably an overestimate;
1408 * but on the other hand we ignore the bookkeeping costs of mark/restore.
1409 * Not clear if it's worth developing a more refined model.
1411 * For regular inner and outer joins, the number of re-fetches can be
1412 * estimated approximately as size of merge join output minus size of
1413 * inner relation. Assume that the distinct key values are 1, 2, ..., and
1414 * denote the number of values of each key in the outer relation as m1,
1415 * m2, ...; in the inner relation, n1, n2, ... Then we have
1417 * size of join = m1 * n1 + m2 * n2 + ...
1419 * number of rescanned tuples = (m1 - 1) * n1 + (m2 - 1) * n2 + ... = m1 *
1420 * n1 + m2 * n2 + ... - (n1 + n2 + ...) = size of join - size of inner
1423 * This equation works correctly for outer tuples having no inner match
1424 * (nk = 0), but not for inner tuples having no outer match (mk = 0); we
1425 * are effectively subtracting those from the number of rescanned tuples,
1426 * when we should not. Can we do better without expensive selectivity
1429 * For SEMI and ANTI joins, only one inner tuple need be rescanned for
1430 * each group of same-keyed outer tuples (assuming that all joinquals
1431 * are merge quals). This makes the effect small enough to ignore,
1432 * so we just set rescannedtuples = 0. Likewise, the whole issue is
1433 * moot if we are working from a unique-ified outer input.
1435 if (sjinfo->jointype == JOIN_SEMI ||
1436 sjinfo->jointype == JOIN_ANTI)
1437 rescannedtuples = 0;
1438 else if (IsA(outer_path, UniquePath))
1439 rescannedtuples = 0;
1442 rescannedtuples = mergejointuples - inner_path_rows;
1443 /* Must clamp because of possible underestimate */
1444 if (rescannedtuples < 0)
1445 rescannedtuples = 0;
1447 /* We'll inflate inner run cost this much to account for rescanning */
1448 rescanratio = 1.0 + (rescannedtuples / inner_path_rows);
1451 * A merge join will stop as soon as it exhausts either input stream
1452 * (unless it's an outer join, in which case the outer side has to be
1453 * scanned all the way anyway). Estimate fraction of the left and right
1454 * inputs that will actually need to be scanned. Likewise, we can
1455 * estimate the number of rows that will be skipped before the first
1456 * join pair is found, which should be factored into startup cost.
1457 * We use only the first (most significant) merge clause for this purpose.
1458 * Since mergejoinscansel() is a fairly expensive computation, we cache
1459 * the results in the merge clause RestrictInfo.
1461 if (mergeclauses && path->jpath.jointype != JOIN_FULL)
1463 RestrictInfo *firstclause = (RestrictInfo *) linitial(mergeclauses);
1468 MergeScanSelCache *cache;
1470 /* Get the input pathkeys to determine the sort-order details */
1471 opathkeys = outersortkeys ? outersortkeys : outer_path->pathkeys;
1472 ipathkeys = innersortkeys ? innersortkeys : inner_path->pathkeys;
1475 opathkey = (PathKey *) linitial(opathkeys);
1476 ipathkey = (PathKey *) linitial(ipathkeys);
1477 /* debugging check */
1478 if (opathkey->pk_opfamily != ipathkey->pk_opfamily ||
1479 opathkey->pk_strategy != ipathkey->pk_strategy ||
1480 opathkey->pk_nulls_first != ipathkey->pk_nulls_first)
1481 elog(ERROR, "left and right pathkeys do not match in mergejoin");
1483 /* Get the selectivity with caching */
1484 cache = cached_scansel(root, firstclause, opathkey);
1486 if (bms_is_subset(firstclause->left_relids,
1487 outer_path->parent->relids))
1489 /* left side of clause is outer */
1490 outerstartsel = cache->leftstartsel;
1491 outerendsel = cache->leftendsel;
1492 innerstartsel = cache->rightstartsel;
1493 innerendsel = cache->rightendsel;
1497 /* left side of clause is inner */
1498 outerstartsel = cache->rightstartsel;
1499 outerendsel = cache->rightendsel;
1500 innerstartsel = cache->leftstartsel;
1501 innerendsel = cache->leftendsel;
1503 if (path->jpath.jointype == JOIN_LEFT ||
1504 path->jpath.jointype == JOIN_ANTI)
1506 outerstartsel = 0.0;
1509 else if (path->jpath.jointype == JOIN_RIGHT)
1511 innerstartsel = 0.0;
1517 /* cope with clauseless or full mergejoin */
1518 outerstartsel = innerstartsel = 0.0;
1519 outerendsel = innerendsel = 1.0;
1523 * Convert selectivities to row counts. We force outer_rows and
1524 * inner_rows to be at least 1, but the skip_rows estimates can be zero.
1526 outer_skip_rows = rint(outer_path_rows * outerstartsel);
1527 inner_skip_rows = rint(inner_path_rows * innerstartsel);
1528 outer_rows = clamp_row_est(outer_path_rows * outerendsel);
1529 inner_rows = clamp_row_est(inner_path_rows * innerendsel);
1531 Assert(outer_skip_rows <= outer_rows);
1532 Assert(inner_skip_rows <= inner_rows);
1535 * Readjust scan selectivities to account for above rounding. This is
1536 * normally an insignificant effect, but when there are only a few rows in
1537 * the inputs, failing to do this makes for a large percentage error.
1539 outerstartsel = outer_skip_rows / outer_path_rows;
1540 innerstartsel = inner_skip_rows / inner_path_rows;
1541 outerendsel = outer_rows / outer_path_rows;
1542 innerendsel = inner_rows / inner_path_rows;
1544 Assert(outerstartsel <= outerendsel);
1545 Assert(innerstartsel <= innerendsel);
1547 /* cost of source data */
1549 if (outersortkeys) /* do we need to sort outer? */
1551 cost_sort(&sort_path,
1554 outer_path->total_cost,
1556 outer_path->parent->width,
1558 startup_cost += sort_path.startup_cost;
1559 startup_cost += (sort_path.total_cost - sort_path.startup_cost)
1561 run_cost += (sort_path.total_cost - sort_path.startup_cost)
1562 * (outerendsel - outerstartsel);
1566 startup_cost += outer_path->startup_cost;
1567 startup_cost += (outer_path->total_cost - outer_path->startup_cost)
1569 run_cost += (outer_path->total_cost - outer_path->startup_cost)
1570 * (outerendsel - outerstartsel);
1573 if (innersortkeys) /* do we need to sort inner? */
1575 cost_sort(&sort_path,
1578 inner_path->total_cost,
1580 inner_path->parent->width,
1582 startup_cost += sort_path.startup_cost;
1583 startup_cost += (sort_path.total_cost - sort_path.startup_cost)
1584 * innerstartsel * rescanratio;
1585 run_cost += (sort_path.total_cost - sort_path.startup_cost)
1586 * (innerendsel - innerstartsel) * rescanratio;
1590 startup_cost += inner_path->startup_cost;
1591 startup_cost += (inner_path->total_cost - inner_path->startup_cost)
1592 * innerstartsel * rescanratio;
1593 run_cost += (inner_path->total_cost - inner_path->startup_cost)
1594 * (innerendsel - innerstartsel) * rescanratio;
1600 * The number of tuple comparisons needed is approximately number of outer
1601 * rows plus number of inner rows plus number of rescanned tuples (can we
1602 * refine this?). At each one, we need to evaluate the mergejoin quals.
1604 startup_cost += merge_qual_cost.startup;
1605 startup_cost += merge_qual_cost.per_tuple *
1606 (outer_skip_rows + inner_skip_rows * rescanratio);
1607 run_cost += merge_qual_cost.per_tuple *
1608 ((outer_rows - outer_skip_rows) +
1609 (inner_rows - inner_skip_rows) * rescanratio);
1612 * For each tuple that gets through the mergejoin proper, we charge
1613 * cpu_tuple_cost plus the cost of evaluating additional restriction
1614 * clauses that are to be applied at the join. (This is pessimistic since
1615 * not all of the quals may get evaluated at each tuple.)
1617 startup_cost += qp_qual_cost.startup;
1618 cpu_per_tuple = cpu_tuple_cost + qp_qual_cost.per_tuple;
1619 run_cost += cpu_per_tuple * mergejointuples;
1621 path->jpath.path.startup_cost = startup_cost;
1622 path->jpath.path.total_cost = startup_cost + run_cost;
1626 * run mergejoinscansel() with caching
1628 static MergeScanSelCache *
1629 cached_scansel(PlannerInfo *root, RestrictInfo *rinfo, PathKey *pathkey)
1631 MergeScanSelCache *cache;
1633 Selectivity leftstartsel,
1637 MemoryContext oldcontext;
1639 /* Do we have this result already? */
1640 foreach(lc, rinfo->scansel_cache)
1642 cache = (MergeScanSelCache *) lfirst(lc);
1643 if (cache->opfamily == pathkey->pk_opfamily &&
1644 cache->strategy == pathkey->pk_strategy &&
1645 cache->nulls_first == pathkey->pk_nulls_first)
1649 /* Nope, do the computation */
1650 mergejoinscansel(root,
1651 (Node *) rinfo->clause,
1652 pathkey->pk_opfamily,
1653 pathkey->pk_strategy,
1654 pathkey->pk_nulls_first,
1660 /* Cache the result in suitably long-lived workspace */
1661 oldcontext = MemoryContextSwitchTo(root->planner_cxt);
1663 cache = (MergeScanSelCache *) palloc(sizeof(MergeScanSelCache));
1664 cache->opfamily = pathkey->pk_opfamily;
1665 cache->strategy = pathkey->pk_strategy;
1666 cache->nulls_first = pathkey->pk_nulls_first;
1667 cache->leftstartsel = leftstartsel;
1668 cache->leftendsel = leftendsel;
1669 cache->rightstartsel = rightstartsel;
1670 cache->rightendsel = rightendsel;
1672 rinfo->scansel_cache = lappend(rinfo->scansel_cache, cache);
1674 MemoryContextSwitchTo(oldcontext);
1681 * Determines and returns the cost of joining two relations using the
1682 * hash join algorithm.
1684 * 'path' is already filled in except for the cost fields
1685 * 'sjinfo' is extra info about the join for selectivity estimation
1687 * Note: path's hashclauses should be a subset of the joinrestrictinfo list
1690 cost_hashjoin(HashPath *path, PlannerInfo *root, SpecialJoinInfo *sjinfo)
1692 Path *outer_path = path->jpath.outerjoinpath;
1693 Path *inner_path = path->jpath.innerjoinpath;
1694 List *hashclauses = path->path_hashclauses;
1695 Cost startup_cost = 0;
1698 QualCost hash_qual_cost;
1699 QualCost qp_qual_cost;
1700 double hashjointuples;
1701 double outer_path_rows = PATH_ROWS(outer_path);
1702 double inner_path_rows = PATH_ROWS(inner_path);
1703 int num_hashclauses = list_length(hashclauses);
1706 double virtualbuckets;
1707 Selectivity innerbucketsize;
1710 if (!enable_hashjoin)
1711 startup_cost += disable_cost;
1714 * Compute cost of the hashquals and qpquals (other restriction clauses)
1717 cost_qual_eval(&hash_qual_cost, hashclauses, root);
1718 cost_qual_eval(&qp_qual_cost, path->jpath.joinrestrictinfo, root);
1719 qp_qual_cost.startup -= hash_qual_cost.startup;
1720 qp_qual_cost.per_tuple -= hash_qual_cost.per_tuple;
1723 * Get approx # tuples passing the hashquals. We use approx_tuple_count
1724 * here for speed --- in most cases, any errors won't affect the result
1727 hashjointuples = approx_tuple_count(root, &path->jpath,
1728 hashclauses, sjinfo);
1730 /* cost of source data */
1731 startup_cost += outer_path->startup_cost;
1732 run_cost += outer_path->total_cost - outer_path->startup_cost;
1733 startup_cost += inner_path->total_cost;
1736 * Cost of computing hash function: must do it once per input tuple. We
1737 * charge one cpu_operator_cost for each column's hash function. Also,
1738 * tack on one cpu_tuple_cost per inner row, to model the costs of
1739 * inserting the row into the hashtable.
1741 * XXX when a hashclause is more complex than a single operator, we really
1742 * should charge the extra eval costs of the left or right side, as
1743 * appropriate, here. This seems more work than it's worth at the moment.
1745 startup_cost += (cpu_operator_cost * num_hashclauses + cpu_tuple_cost)
1747 run_cost += cpu_operator_cost * num_hashclauses * outer_path_rows;
1749 /* Get hash table size that executor would use for inner relation */
1750 ExecChooseHashTableSize(inner_path_rows,
1751 inner_path->parent->width,
1754 virtualbuckets = (double) numbuckets *(double) numbatches;
1757 * Determine bucketsize fraction for inner relation. We use the smallest
1758 * bucketsize estimated for any individual hashclause; this is undoubtedly
1761 * BUT: if inner relation has been unique-ified, we can assume it's good
1762 * for hashing. This is important both because it's the right answer, and
1763 * because we avoid contaminating the cache with a value that's wrong for
1764 * non-unique-ified paths.
1766 if (IsA(inner_path, UniquePath))
1767 innerbucketsize = 1.0 / virtualbuckets;
1770 innerbucketsize = 1.0;
1771 foreach(hcl, hashclauses)
1773 RestrictInfo *restrictinfo = (RestrictInfo *) lfirst(hcl);
1774 Selectivity thisbucketsize;
1776 Assert(IsA(restrictinfo, RestrictInfo));
1779 * First we have to figure out which side of the hashjoin clause
1780 * is the inner side.
1782 * Since we tend to visit the same clauses over and over when
1783 * planning a large query, we cache the bucketsize estimate in the
1784 * RestrictInfo node to avoid repeated lookups of statistics.
1786 if (bms_is_subset(restrictinfo->right_relids,
1787 inner_path->parent->relids))
1789 /* righthand side is inner */
1790 thisbucketsize = restrictinfo->right_bucketsize;
1791 if (thisbucketsize < 0)
1793 /* not cached yet */
1795 estimate_hash_bucketsize(root,
1796 get_rightop(restrictinfo->clause),
1798 restrictinfo->right_bucketsize = thisbucketsize;
1803 Assert(bms_is_subset(restrictinfo->left_relids,
1804 inner_path->parent->relids));
1805 /* lefthand side is inner */
1806 thisbucketsize = restrictinfo->left_bucketsize;
1807 if (thisbucketsize < 0)
1809 /* not cached yet */
1811 estimate_hash_bucketsize(root,
1812 get_leftop(restrictinfo->clause),
1814 restrictinfo->left_bucketsize = thisbucketsize;
1818 if (innerbucketsize > thisbucketsize)
1819 innerbucketsize = thisbucketsize;
1824 * If inner relation is too big then we will need to "batch" the join,
1825 * which implies writing and reading most of the tuples to disk an extra
1826 * time. Charge seq_page_cost per page, since the I/O should be nice and
1827 * sequential. Writing the inner rel counts as startup cost, all the rest
1832 double outerpages = page_size(outer_path_rows,
1833 outer_path->parent->width);
1834 double innerpages = page_size(inner_path_rows,
1835 inner_path->parent->width);
1837 startup_cost += seq_page_cost * innerpages;
1838 run_cost += seq_page_cost * (innerpages + 2 * outerpages);
1844 * The number of tuple comparisons needed is the number of outer tuples
1845 * times the typical number of tuples in a hash bucket, which is the inner
1846 * relation size times its bucketsize fraction. At each one, we need to
1847 * evaluate the hashjoin quals. But actually, charging the full qual eval
1848 * cost at each tuple is pessimistic, since we don't evaluate the quals
1849 * unless the hash values match exactly. For lack of a better idea, halve
1850 * the cost estimate to allow for that.
1852 startup_cost += hash_qual_cost.startup;
1853 run_cost += hash_qual_cost.per_tuple *
1854 outer_path_rows * clamp_row_est(inner_path_rows * innerbucketsize) * 0.5;
1857 * For each tuple that gets through the hashjoin proper, we charge
1858 * cpu_tuple_cost plus the cost of evaluating additional restriction
1859 * clauses that are to be applied at the join. (This is pessimistic since
1860 * not all of the quals may get evaluated at each tuple.)
1862 startup_cost += qp_qual_cost.startup;
1863 cpu_per_tuple = cpu_tuple_cost + qp_qual_cost.per_tuple;
1864 run_cost += cpu_per_tuple * hashjointuples;
1866 path->jpath.path.startup_cost = startup_cost;
1867 path->jpath.path.total_cost = startup_cost + run_cost;
1873 * Figure the costs for a SubPlan (or initplan).
1875 * Note: we could dig the subplan's Plan out of the root list, but in practice
1876 * all callers have it handy already, so we make them pass it.
1879 cost_subplan(PlannerInfo *root, SubPlan *subplan, Plan *plan)
1883 /* Figure any cost for evaluating the testexpr */
1884 cost_qual_eval(&sp_cost,
1885 make_ands_implicit((Expr *) subplan->testexpr),
1888 if (subplan->useHashTable)
1891 * If we are using a hash table for the subquery outputs, then the
1892 * cost of evaluating the query is a one-time cost. We charge one
1893 * cpu_operator_cost per tuple for the work of loading the hashtable,
1896 sp_cost.startup += plan->total_cost +
1897 cpu_operator_cost * plan->plan_rows;
1900 * The per-tuple costs include the cost of evaluating the lefthand
1901 * expressions, plus the cost of probing the hashtable. We already
1902 * accounted for the lefthand expressions as part of the testexpr,
1903 * and will also have counted one cpu_operator_cost for each
1904 * comparison operator. That is probably too low for the probing
1905 * cost, but it's hard to make a better estimate, so live with it for
1912 * Otherwise we will be rescanning the subplan output on each
1913 * evaluation. We need to estimate how much of the output we will
1914 * actually need to scan. NOTE: this logic should agree with the
1915 * tuple_fraction estimates used by make_subplan() in
1918 Cost plan_run_cost = plan->total_cost - plan->startup_cost;
1920 if (subplan->subLinkType == EXISTS_SUBLINK)
1922 /* we only need to fetch 1 tuple */
1923 sp_cost.per_tuple += plan_run_cost / plan->plan_rows;
1925 else if (subplan->subLinkType == ALL_SUBLINK ||
1926 subplan->subLinkType == ANY_SUBLINK)
1928 /* assume we need 50% of the tuples */
1929 sp_cost.per_tuple += 0.50 * plan_run_cost;
1930 /* also charge a cpu_operator_cost per row examined */
1931 sp_cost.per_tuple += 0.50 * plan->plan_rows * cpu_operator_cost;
1935 /* assume we need all tuples */
1936 sp_cost.per_tuple += plan_run_cost;
1940 * Also account for subplan's startup cost. If the subplan is
1941 * uncorrelated or undirect correlated, AND its topmost node is a Sort
1942 * or Material node, assume that we'll only need to pay its startup
1943 * cost once; otherwise assume we pay the startup cost every time.
1945 if (subplan->parParam == NIL &&
1947 IsA(plan, Material)))
1948 sp_cost.startup += plan->startup_cost;
1950 sp_cost.per_tuple += plan->startup_cost;
1953 subplan->startup_cost = sp_cost.startup;
1954 subplan->per_call_cost = sp_cost.per_tuple;
1960 * Estimate the CPU costs of evaluating a WHERE clause.
1961 * The input can be either an implicitly-ANDed list of boolean
1962 * expressions, or a list of RestrictInfo nodes. (The latter is
1963 * preferred since it allows caching of the results.)
1964 * The result includes both a one-time (startup) component,
1965 * and a per-evaluation component.
1968 cost_qual_eval(QualCost *cost, List *quals, PlannerInfo *root)
1970 cost_qual_eval_context context;
1973 context.root = root;
1974 context.total.startup = 0;
1975 context.total.per_tuple = 0;
1977 /* We don't charge any cost for the implicit ANDing at top level ... */
1981 Node *qual = (Node *) lfirst(l);
1983 cost_qual_eval_walker(qual, &context);
1986 *cost = context.total;
1990 * cost_qual_eval_node
1991 * As above, for a single RestrictInfo or expression.
1994 cost_qual_eval_node(QualCost *cost, Node *qual, PlannerInfo *root)
1996 cost_qual_eval_context context;
1998 context.root = root;
1999 context.total.startup = 0;
2000 context.total.per_tuple = 0;
2002 cost_qual_eval_walker(qual, &context);
2004 *cost = context.total;
2008 cost_qual_eval_walker(Node *node, cost_qual_eval_context *context)
2014 * RestrictInfo nodes contain an eval_cost field reserved for this
2015 * routine's use, so that it's not necessary to evaluate the qual clause's
2016 * cost more than once. If the clause's cost hasn't been computed yet,
2017 * the field's startup value will contain -1.
2019 if (IsA(node, RestrictInfo))
2021 RestrictInfo *rinfo = (RestrictInfo *) node;
2023 if (rinfo->eval_cost.startup < 0)
2025 cost_qual_eval_context locContext;
2027 locContext.root = context->root;
2028 locContext.total.startup = 0;
2029 locContext.total.per_tuple = 0;
2032 * For an OR clause, recurse into the marked-up tree so that we
2033 * set the eval_cost for contained RestrictInfos too.
2035 if (rinfo->orclause)
2036 cost_qual_eval_walker((Node *) rinfo->orclause, &locContext);
2038 cost_qual_eval_walker((Node *) rinfo->clause, &locContext);
2041 * If the RestrictInfo is marked pseudoconstant, it will be tested
2042 * only once, so treat its cost as all startup cost.
2044 if (rinfo->pseudoconstant)
2046 /* count one execution during startup */
2047 locContext.total.startup += locContext.total.per_tuple;
2048 locContext.total.per_tuple = 0;
2050 rinfo->eval_cost = locContext.total;
2052 context->total.startup += rinfo->eval_cost.startup;
2053 context->total.per_tuple += rinfo->eval_cost.per_tuple;
2054 /* do NOT recurse into children */
2059 * For each operator or function node in the given tree, we charge the
2060 * estimated execution cost given by pg_proc.procost (remember to multiply
2061 * this by cpu_operator_cost).
2063 * Vars and Consts are charged zero, and so are boolean operators (AND,
2064 * OR, NOT). Simplistic, but a lot better than no model at all.
2066 * Should we try to account for the possibility of short-circuit
2067 * evaluation of AND/OR? Probably *not*, because that would make the
2068 * results depend on the clause ordering, and we are not in any position
2069 * to expect that the current ordering of the clauses is the one that's
2070 * going to end up being used. (Is it worth applying order_qual_clauses
2071 * much earlier in the planning process to fix this?)
2073 if (IsA(node, FuncExpr))
2075 context->total.per_tuple +=
2076 get_func_cost(((FuncExpr *) node)->funcid) * cpu_operator_cost;
2078 else if (IsA(node, OpExpr) ||
2079 IsA(node, DistinctExpr) ||
2080 IsA(node, NullIfExpr))
2082 /* rely on struct equivalence to treat these all alike */
2083 set_opfuncid((OpExpr *) node);
2084 context->total.per_tuple +=
2085 get_func_cost(((OpExpr *) node)->opfuncid) * cpu_operator_cost;
2087 else if (IsA(node, ScalarArrayOpExpr))
2090 * Estimate that the operator will be applied to about half of the
2091 * array elements before the answer is determined.
2093 ScalarArrayOpExpr *saop = (ScalarArrayOpExpr *) node;
2094 Node *arraynode = (Node *) lsecond(saop->args);
2096 set_sa_opfuncid(saop);
2097 context->total.per_tuple += get_func_cost(saop->opfuncid) *
2098 cpu_operator_cost * estimate_array_length(arraynode) * 0.5;
2100 else if (IsA(node, CoerceViaIO))
2102 CoerceViaIO *iocoerce = (CoerceViaIO *) node;
2107 /* check the result type's input function */
2108 getTypeInputInfo(iocoerce->resulttype,
2109 &iofunc, &typioparam);
2110 context->total.per_tuple += get_func_cost(iofunc) * cpu_operator_cost;
2111 /* check the input type's output function */
2112 getTypeOutputInfo(exprType((Node *) iocoerce->arg),
2113 &iofunc, &typisvarlena);
2114 context->total.per_tuple += get_func_cost(iofunc) * cpu_operator_cost;
2116 else if (IsA(node, ArrayCoerceExpr))
2118 ArrayCoerceExpr *acoerce = (ArrayCoerceExpr *) node;
2119 Node *arraynode = (Node *) acoerce->arg;
2121 if (OidIsValid(acoerce->elemfuncid))
2122 context->total.per_tuple += get_func_cost(acoerce->elemfuncid) *
2123 cpu_operator_cost * estimate_array_length(arraynode);
2125 else if (IsA(node, RowCompareExpr))
2127 /* Conservatively assume we will check all the columns */
2128 RowCompareExpr *rcexpr = (RowCompareExpr *) node;
2131 foreach(lc, rcexpr->opnos)
2133 Oid opid = lfirst_oid(lc);
2135 context->total.per_tuple += get_func_cost(get_opcode(opid)) *
2139 else if (IsA(node, CurrentOfExpr))
2141 /* Report high cost to prevent selection of anything but TID scan */
2142 context->total.startup += disable_cost;
2144 else if (IsA(node, SubLink))
2146 /* This routine should not be applied to un-planned expressions */
2147 elog(ERROR, "cannot handle unplanned sub-select");
2149 else if (IsA(node, SubPlan))
2152 * A subplan node in an expression typically indicates that the
2153 * subplan will be executed on each evaluation, so charge accordingly.
2154 * (Sub-selects that can be executed as InitPlans have already been
2155 * removed from the expression.)
2157 SubPlan *subplan = (SubPlan *) node;
2159 context->total.startup += subplan->startup_cost;
2160 context->total.per_tuple += subplan->per_call_cost;
2163 * We don't want to recurse into the testexpr, because it was already
2164 * counted in the SubPlan node's costs. So we're done.
2168 else if (IsA(node, AlternativeSubPlan))
2171 * Arbitrarily use the first alternative plan for costing. (We should
2172 * certainly only include one alternative, and we don't yet have
2173 * enough information to know which one the executor is most likely
2176 AlternativeSubPlan *asplan = (AlternativeSubPlan *) node;
2178 return cost_qual_eval_walker((Node *) linitial(asplan->subplans),
2182 /* recurse into children */
2183 return expression_tree_walker(node, cost_qual_eval_walker,
2189 * approx_tuple_count
2190 * Quick-and-dirty estimation of the number of join rows passing
2191 * a set of qual conditions.
2193 * The quals can be either an implicitly-ANDed list of boolean expressions,
2194 * or a list of RestrictInfo nodes (typically the latter).
2196 * This is quick-and-dirty because we bypass clauselist_selectivity, and
2197 * simply multiply the independent clause selectivities together. Now
2198 * clauselist_selectivity often can't do any better than that anyhow, but
2199 * for some situations (such as range constraints) it is smarter. However,
2200 * we can't effectively cache the results of clauselist_selectivity, whereas
2201 * the individual clause selectivities can be and are cached.
2203 * Since we are only using the results to estimate how many potential
2204 * output tuples are generated and passed through qpqual checking, it
2205 * seems OK to live with the approximation.
2208 approx_tuple_count(PlannerInfo *root, JoinPath *path,
2209 List *quals, SpecialJoinInfo *sjinfo)
2212 double outer_tuples = path->outerjoinpath->parent->rows;
2213 double inner_tuples = path->innerjoinpath->parent->rows;
2214 Selectivity selec = 1.0;
2217 /* Get the approximate selectivity */
2220 Node *qual = (Node *) lfirst(l);
2222 /* Note that clause_selectivity will be able to cache its result */
2223 selec *= clause_selectivity(root, qual, 0, sjinfo->jointype, sjinfo);
2226 /* Apply it correctly using the input relation sizes */
2227 if (sjinfo->jointype == JOIN_SEMI)
2228 tuples = selec * outer_tuples;
2229 else if (sjinfo->jointype == JOIN_ANTI)
2230 tuples = (1.0 - selec) * outer_tuples;
2232 tuples = selec * outer_tuples * inner_tuples;
2234 return clamp_row_est(tuples);
2239 * set_baserel_size_estimates
2240 * Set the size estimates for the given base relation.
2242 * The rel's targetlist and restrictinfo list must have been constructed
2245 * We set the following fields of the rel node:
2246 * rows: the estimated number of output tuples (after applying
2247 * restriction clauses).
2248 * width: the estimated average output tuple width in bytes.
2249 * baserestrictcost: estimated cost of evaluating baserestrictinfo clauses.
2252 set_baserel_size_estimates(PlannerInfo *root, RelOptInfo *rel)
2256 /* Should only be applied to base relations */
2257 Assert(rel->relid > 0);
2259 nrows = rel->tuples *
2260 clauselist_selectivity(root,
2261 rel->baserestrictinfo,
2266 rel->rows = clamp_row_est(nrows);
2268 cost_qual_eval(&rel->baserestrictcost, rel->baserestrictinfo, root);
2270 set_rel_width(root, rel);
2274 * set_joinrel_size_estimates
2275 * Set the size estimates for the given join relation.
2277 * The rel's targetlist must have been constructed already, and a
2278 * restriction clause list that matches the given component rels must
2281 * Since there is more than one way to make a joinrel for more than two
2282 * base relations, the results we get here could depend on which component
2283 * rel pair is provided. In theory we should get the same answers no matter
2284 * which pair is provided; in practice, since the selectivity estimation
2285 * routines don't handle all cases equally well, we might not. But there's
2286 * not much to be done about it. (Would it make sense to repeat the
2287 * calculations for each pair of input rels that's encountered, and somehow
2288 * average the results? Probably way more trouble than it's worth.)
2290 * We set only the rows field here. The width field was already set by
2291 * build_joinrel_tlist, and baserestrictcost is not used for join rels.
2294 set_joinrel_size_estimates(PlannerInfo *root, RelOptInfo *rel,
2295 RelOptInfo *outer_rel,
2296 RelOptInfo *inner_rel,
2297 SpecialJoinInfo *sjinfo,
2300 JoinType jointype = sjinfo->jointype;
2306 * Compute joinclause selectivity. Note that we are only considering
2307 * clauses that become restriction clauses at this join level; we are not
2308 * double-counting them because they were not considered in estimating the
2309 * sizes of the component rels.
2311 * For an outer join, we have to distinguish the selectivity of the join's
2312 * own clauses (JOIN/ON conditions) from any clauses that were "pushed
2313 * down". For inner joins we just count them all as joinclauses.
2315 if (IS_OUTER_JOIN(jointype))
2317 List *joinquals = NIL;
2318 List *pushedquals = NIL;
2321 /* Grovel through the clauses to separate into two lists */
2322 foreach(l, restrictlist)
2324 RestrictInfo *rinfo = (RestrictInfo *) lfirst(l);
2326 Assert(IsA(rinfo, RestrictInfo));
2327 if (rinfo->is_pushed_down)
2328 pushedquals = lappend(pushedquals, rinfo);
2330 joinquals = lappend(joinquals, rinfo);
2333 /* Get the separate selectivities */
2334 jselec = clauselist_selectivity(root,
2339 pselec = clauselist_selectivity(root,
2345 /* Avoid leaking a lot of ListCells */
2346 list_free(joinquals);
2347 list_free(pushedquals);
2351 jselec = clauselist_selectivity(root,
2356 pselec = 0.0; /* not used, keep compiler quiet */
2360 * Basically, we multiply size of Cartesian product by selectivity.
2362 * If we are doing an outer join, take that into account: the joinqual
2363 * selectivity has to be clamped using the knowledge that the output must
2364 * be at least as large as the non-nullable input. However, any
2365 * pushed-down quals are applied after the outer join, so their
2366 * selectivity applies fully.
2368 * For JOIN_SEMI and JOIN_ANTI, the selectivity is defined as the fraction
2369 * of LHS rows that have matches, and we apply that straightforwardly.
2374 nrows = outer_rel->rows * inner_rel->rows * jselec;
2377 nrows = outer_rel->rows * inner_rel->rows * jselec;
2378 if (nrows < outer_rel->rows)
2379 nrows = outer_rel->rows;
2383 nrows = outer_rel->rows * inner_rel->rows * jselec;
2384 if (nrows < outer_rel->rows)
2385 nrows = outer_rel->rows;
2386 if (nrows < inner_rel->rows)
2387 nrows = inner_rel->rows;
2391 nrows = outer_rel->rows * jselec;
2395 nrows = outer_rel->rows * (1.0 - jselec);
2399 /* other values not expected here */
2400 elog(ERROR, "unrecognized join type: %d", (int) jointype);
2401 nrows = 0; /* keep compiler quiet */
2405 rel->rows = clamp_row_est(nrows);
2409 * set_function_size_estimates
2410 * Set the size estimates for a base relation that is a function call.
2412 * The rel's targetlist and restrictinfo list must have been constructed
2415 * We set the same fields as set_baserel_size_estimates.
2418 set_function_size_estimates(PlannerInfo *root, RelOptInfo *rel)
2422 /* Should only be applied to base relations that are functions */
2423 Assert(rel->relid > 0);
2424 rte = planner_rt_fetch(rel->relid, root);
2425 Assert(rte->rtekind == RTE_FUNCTION);
2427 /* Estimate number of rows the function itself will return */
2428 rel->tuples = clamp_row_est(expression_returns_set_rows(rte->funcexpr));
2430 /* Now estimate number of output rows, etc */
2431 set_baserel_size_estimates(root, rel);
2435 * set_values_size_estimates
2436 * Set the size estimates for a base relation that is a values list.
2438 * The rel's targetlist and restrictinfo list must have been constructed
2441 * We set the same fields as set_baserel_size_estimates.
2444 set_values_size_estimates(PlannerInfo *root, RelOptInfo *rel)
2448 /* Should only be applied to base relations that are values lists */
2449 Assert(rel->relid > 0);
2450 rte = planner_rt_fetch(rel->relid, root);
2451 Assert(rte->rtekind == RTE_VALUES);
2454 * Estimate number of rows the values list will return. We know this
2455 * precisely based on the list length (well, barring set-returning
2456 * functions in list items, but that's a refinement not catered for
2457 * anywhere else either).
2459 rel->tuples = list_length(rte->values_lists);
2461 /* Now estimate number of output rows, etc */
2462 set_baserel_size_estimates(root, rel);
2468 * Set the estimated output width of a base relation.
2470 * NB: this works best on plain relations because it prefers to look at
2471 * real Vars. It will fail to make use of pg_statistic info when applied
2472 * to a subquery relation, even if the subquery outputs are simple vars
2473 * that we could have gotten info for. Is it worth trying to be smarter
2476 * The per-attribute width estimates are cached for possible re-use while
2477 * building join relations.
2480 set_rel_width(PlannerInfo *root, RelOptInfo *rel)
2482 int32 tuple_width = 0;
2487 * Usually (perhaps always), all the Vars have the same reloid, so we can
2488 * save some redundant list-searching by doing getrelid just once.
2491 rel_reloid = getrelid(rel->relid, root->parse->rtable);
2493 rel_reloid = InvalidOid; /* probably can't happen */
2495 foreach(tllist, rel->reltargetlist)
2497 Var *var = (Var *) lfirst(tllist);
2502 /* For now, punt on whole-row child Vars */
2505 tuple_width += 32; /* arbitrary */
2509 ndx = var->varattno - rel->min_attr;
2512 * The width probably hasn't been cached yet, but may as well check
2514 if (rel->attr_widths[ndx] > 0)
2516 tuple_width += rel->attr_widths[ndx];
2520 if (var->varno == rel->relid)
2521 var_reloid = rel_reloid;
2523 var_reloid = getrelid(var->varno, root->parse->rtable);
2525 if (var_reloid != InvalidOid)
2527 item_width = get_attavgwidth(var_reloid, var->varattno);
2530 rel->attr_widths[ndx] = item_width;
2531 tuple_width += item_width;
2537 * Not a plain relation, or can't find statistics for it. Estimate
2538 * using just the type info.
2540 item_width = get_typavgwidth(var->vartype, var->vartypmod);
2541 Assert(item_width > 0);
2542 rel->attr_widths[ndx] = item_width;
2543 tuple_width += item_width;
2545 Assert(tuple_width >= 0);
2546 rel->width = tuple_width;
2550 * relation_byte_size
2551 * Estimate the storage space in bytes for a given number of tuples
2552 * of a given width (size in bytes).
2555 relation_byte_size(double tuples, int width)
2557 return tuples * (MAXALIGN(width) + MAXALIGN(sizeof(HeapTupleHeaderData)));
2562 * Returns an estimate of the number of pages covered by a given
2563 * number of tuples of a given width (size in bytes).
2566 page_size(double tuples, int width)
2568 return ceil(relation_byte_size(tuples, width) / BLCKSZ);